Add the rt linux 4.1.3-rt3 as base

Import the rt linux 4.1.3-rt3 as OPNFV kvm base.

It's from git://git.kernel.org/pub/scm/linux/kernel/git/rt/linux-rt-devel.git linux-4.1.y-rt and
the base is:

commit 0917f823c59692d751951bf5ea699a2d1e2f26a2
Author: Sebastian Andrzej Siewior <bigeasy@linutronix.de>
Date:   Sat Jul 25 12:13:34 2015 +0200

    Prepare v4.1.3-rt3

    Signed-off-by: Sebastian Andrzej Siewior <bigeasy@linutronix.de>

We lose all the git history this way and it's not good. We
should apply another opnfv project repo in future.

Change-Id: I87543d81c9df70d99c5001fbdf646b202c19f423
Signed-off-by: Yunhong Jiang <yunhong.jiang@intel.com>

13 files changed, 3503 insertions, 0 deletions

diff --git a/kernel/Documentation/security/00-INDEX b/kernel/Documentation/security/00-INDEX
new file mode 100644
index 000000000..45c82fd3e
--- /dev/null
+++ b/kernel/Documentation/security/00-INDEX
@@ -0,0 +1,26 @@
+00-INDEX
+	- this file.
+LSM.txt
+	- description of the Linux Security Module framework.
+SELinux.txt
+	- how to get started with the SELinux security enhancement.
+Smack.txt
+	- documentation on the Smack Linux Security Module.
+Yama.txt
+	- documentation on the Yama Linux Security Module.
+apparmor.txt
+	- documentation on the AppArmor security extension.
+credentials.txt
+	- documentation about credentials in Linux.
+keys-ecryptfs.txt
+	- description of the encryption keys for the ecryptfs filesystem.
+keys-request-key.txt
+	- description of the kernel key request service.
+keys-trusted-encrypted.txt
+	- info on the Trusted and Encrypted keys in the kernel key ring service.
+keys.txt
+	- description of the kernel key retention service.
+tomoyo.txt
+	- documentation on the TOMOYO Linux Security Module.
+IMA-templates.txt
+	- documentation on the template management mechanism for IMA.
diff --git a/kernel/Documentation/security/IMA-templates.txt b/kernel/Documentation/security/IMA-templates.txt
new file mode 100644
index 000000000..839b5dad9
--- /dev/null
+++ b/kernel/Documentation/security/IMA-templates.txt
@@ -0,0 +1,88 @@
+                       IMA Template Management Mechanism
+
+
+==== INTRODUCTION ====
+
+The original 'ima' template is fixed length, containing the filedata hash
+and pathname. The filedata hash is limited to 20 bytes (md5/sha1).
+The pathname is a null terminated string, limited to 255 characters.
+To overcome these limitations and to add additional file metadata, it is
+necessary to extend the current version of IMA by defining additional
+templates. For example, information that could be possibly reported are
+the inode UID/GID or the LSM labels either of the inode and of the process
+that is accessing it.
+
+However, the main problem to introduce this feature is that, each time
+a new template is defined, the functions that generate and display
+the measurements list would include the code for handling a new format
+and, thus, would significantly grow over the time.
+
+The proposed solution solves this problem by separating the template
+management from the remaining IMA code. The core of this solution is the
+definition of two new data structures: a template descriptor, to determine
+which information should be included in the measurement list; a template
+field, to generate and display data of a given type.
+
+Managing templates with these structures is very simple. To support
+a new data type, developers define the field identifier and implement
+two functions, init() and show(), respectively to generate and display
+measurement entries. Defining a new template descriptor requires
+specifying the template format (a string of field identifiers separated
+by the '|' character) through the 'ima_template_fmt' kernel command line
+parameter. At boot time, IMA initializes the chosen template descriptor
+by translating the format into an array of template fields structures taken
+from the set of the supported ones.
+
+After the initialization step, IMA will call ima_alloc_init_template()
+(new function defined within the patches for the new template management
+mechanism) to generate a new measurement entry by using the template
+descriptor chosen through the kernel configuration or through the newly
+introduced 'ima_template' and 'ima_template_fmt' kernel command line parameters.
+It is during this phase that the advantages of the new architecture are
+clearly shown: the latter function will not contain specific code to handle
+a given template but, instead, it simply calls the init() method of the template
+fields associated to the chosen template descriptor and store the result
+(pointer to allocated data and data length) in the measurement entry structure.
+
+The same mechanism is employed to display measurements entries.
+The functions ima[_ascii]_measurements_show() retrieve, for each entry,
+the template descriptor used to produce that entry and call the show()
+method for each item of the array of template fields structures.
+
+
+
+==== SUPPORTED TEMPLATE FIELDS AND DESCRIPTORS ====
+
+In the following, there is the list of supported template fields
+('<identifier>': description), that can be used to define new template
+descriptors by adding their identifier to the format string
+(support for more data types will be added later):
+
+ - 'd': the digest of the event (i.e. the digest of a measured file),
+        calculated with the SHA1 or MD5 hash algorithm;
+ - 'n': the name of the event (i.e. the file name), with size up to 255 bytes;
+ - 'd-ng': the digest of the event, calculated with an arbitrary hash
+           algorithm (field format: [<hash algo>:]digest, where the digest
+           prefix is shown only if the hash algorithm is not SHA1 or MD5);
+ - 'n-ng': the name of the event, without size limitations;
+ - 'sig': the file signature.
+
+
+Below, there is the list of defined template descriptors:
+ - "ima": its format is 'd|n';
+ - "ima-ng" (default): its format is 'd-ng|n-ng';
+ - "ima-sig": its format is 'd-ng|n-ng|sig'.
+
+
+
+==== USE ====
+
+To specify the template descriptor to be used to generate measurement entries,
+currently the following methods are supported:
+
+ - select a template descriptor among those supported in the kernel
+   configuration ('ima-ng' is the default choice);
+ - specify a template descriptor name from the kernel command line through
+   the 'ima_template=' parameter;
+ - register a new template descriptor with custom format through the kernel
+   command line parameter 'ima_template_fmt='.
diff --git a/kernel/Documentation/security/LSM.txt b/kernel/Documentation/security/LSM.txt
new file mode 100644
index 000000000..3db7e671c
--- /dev/null
+++ b/kernel/Documentation/security/LSM.txt
@@ -0,0 +1,34 @@
+Linux Security Module framework
+-------------------------------
+
+The Linux Security Module (LSM) framework provides a mechanism for
+various security checks to be hooked by new kernel extensions. The name
+"module" is a bit of a misnomer since these extensions are not actually
+loadable kernel modules. Instead, they are selectable at build-time via
+CONFIG_DEFAULT_SECURITY and can be overridden at boot-time via the
+"security=..." kernel command line argument, in the case where multiple
+LSMs were built into a given kernel.
+
+The primary users of the LSM interface are Mandatory Access Control
+(MAC) extensions which provide a comprehensive security policy. Examples
+include SELinux, Smack, Tomoyo, and AppArmor. In addition to the larger
+MAC extensions, other extensions can be built using the LSM to provide
+specific changes to system operation when these tweaks are not available
+in the core functionality of Linux itself.
+
+Without a specific LSM built into the kernel, the default LSM will be the
+Linux capabilities system. Most LSMs choose to extend the capabilities
+system, building their checks on top of the defined capability hooks.
+For more details on capabilities, see capabilities(7) in the Linux
+man-pages project.
+
+Based on https://lkml.org/lkml/2007/10/26/215,
+a new LSM is accepted into the kernel when its intent (a description of
+what it tries to protect against and in what cases one would expect to
+use it) has been appropriately documented in Documentation/security/.
+This allows an LSM's code to be easily compared to its goals, and so
+that end users and distros can make a more informed decision about which
+LSMs suit their requirements.
+
+For extensive documentation on the available LSM hook interfaces, please
+see include/linux/security.h.
diff --git a/kernel/Documentation/security/SELinux.txt b/kernel/Documentation/security/SELinux.txt
new file mode 100644
index 000000000..07eae00f3
--- /dev/null
+++ b/kernel/Documentation/security/SELinux.txt
@@ -0,0 +1,27 @@
+If you want to use SELinux, chances are you will want
+to use the distro-provided policies, or install the
+latest reference policy release from
+	http://oss.tresys.com/projects/refpolicy
+
+However, if you want to install a dummy policy for
+testing, you can do using 'mdp' provided under
+scripts/selinux.  Note that this requires the selinux
+userspace to be installed - in particular you will
+need checkpolicy to compile a kernel, and setfiles and
+fixfiles to label the filesystem.
+
+	1. Compile the kernel with selinux enabled.
+	2. Type 'make' to compile mdp.
+	3. Make sure that you are not running with
+	   SELinux enabled and a real policy.  If
+	   you are, reboot with selinux disabled
+	   before continuing.
+	4. Run install_policy.sh:
+		cd scripts/selinux
+		sh install_policy.sh
+
+Step 4 will create a new dummy policy valid for your
+kernel, with a single selinux user, role, and type.
+It will compile the policy, will set your SELINUXTYPE to
+dummy in /etc/selinux/config, install the compiled policy
+as 'dummy', and relabel your filesystem.
diff --git a/kernel/Documentation/security/Smack.txt b/kernel/Documentation/security/Smack.txt
new file mode 100644
index 000000000..abc82f852
--- /dev/null
+++ b/kernel/Documentation/security/Smack.txt
@@ -0,0 +1,717 @@
+
+
+    "Good for you, you've decided to clean the elevator!"
+    - The Elevator, from Dark Star
+
+Smack is the Simplified Mandatory Access Control Kernel.
+Smack is a kernel based implementation of mandatory access
+control that includes simplicity in its primary design goals.
+
+Smack is not the only Mandatory Access Control scheme
+available for Linux. Those new to Mandatory Access Control
+are encouraged to compare Smack with the other mechanisms
+available to determine which is best suited to the problem
+at hand.
+
+Smack consists of three major components:
+    - The kernel
+    - Basic utilities, which are helpful but not required
+    - Configuration data
+
+The kernel component of Smack is implemented as a Linux
+Security Modules (LSM) module. It requires netlabel and
+works best with file systems that support extended attributes,
+although xattr support is not strictly required.
+It is safe to run a Smack kernel under a "vanilla" distribution.
+
+Smack kernels use the CIPSO IP option. Some network
+configurations are intolerant of IP options and can impede
+access to systems that use them as Smack does.
+
+The current git repository for Smack user space is:
+
+	git://github.com/smack-team/smack.git
+
+This should make and install on most modern distributions.
+There are five commands included in smackutil:
+
+chsmack    - display or set Smack extended attribute values
+smackctl   - load the Smack access rules
+smackaccess - report if a process with one label has access
+              to an object with another
+
+These two commands are obsolete with the introduction of
+the smackfs/load2 and smackfs/cipso2 interfaces.
+
+smackload  - properly formats data for writing to smackfs/load
+smackcipso - properly formats data for writing to smackfs/cipso
+
+In keeping with the intent of Smack, configuration data is
+minimal and not strictly required. The most important
+configuration step is mounting the smackfs pseudo filesystem.
+If smackutil is installed the startup script will take care
+of this, but it can be manually as well.
+
+Add this line to /etc/fstab:
+
+    smackfs /sys/fs/smackfs smackfs defaults 0 0
+
+The /sys/fs/smackfs directory is created by the kernel.
+
+Smack uses extended attributes (xattrs) to store labels on filesystem
+objects. The attributes are stored in the extended attribute security
+name space. A process must have CAP_MAC_ADMIN to change any of these
+attributes.
+
+The extended attributes that Smack uses are:
+
+SMACK64
+	Used to make access control decisions. In almost all cases
+	the label given to a new filesystem object will be the label
+	of the process that created it.
+SMACK64EXEC
+	The Smack label of a process that execs a program file with
+	this attribute set will run with this attribute's value.
+SMACK64MMAP
+	Don't allow the file to be mmapped by a process whose Smack
+	label does not allow all of the access permitted to a process
+	with the label contained in this attribute. This is a very
+	specific use case for shared libraries.
+SMACK64TRANSMUTE
+	Can only have the value "TRUE". If this attribute is present
+	on a directory when an object is created in the directory and
+	the Smack rule (more below) that permitted the write access
+	to the directory includes the transmute ("t") mode the object
+	gets the label of the directory instead of the label of the
+	creating process. If the object being created is a directory
+	the SMACK64TRANSMUTE attribute is set as well.
+SMACK64IPIN
+	This attribute is only available on file descriptors for sockets.
+	Use the Smack label in this attribute for access control
+	decisions on packets being delivered to this socket.
+SMACK64IPOUT
+	This attribute is only available on file descriptors for sockets.
+	Use the Smack label in this attribute for access control
+	decisions on packets coming from this socket.
+
+There are multiple ways to set a Smack label on a file:
+
+    # attr -S -s SMACK64 -V "value" path
+    # chsmack -a value path
+
+A process can see the Smack label it is running with by
+reading /proc/self/attr/current. A process with CAP_MAC_ADMIN
+can set the process Smack by writing there.
+
+Most Smack configuration is accomplished by writing to files
+in the smackfs filesystem. This pseudo-filesystem is mounted
+on /sys/fs/smackfs.
+
+access
+	This interface reports whether a subject with the specified
+	Smack label has a particular access to an object with a
+	specified Smack label. Write a fixed format access rule to
+	this file. The next read will indicate whether the access
+	would be permitted. The text will be either "1" indicating
+	access, or "0" indicating denial.
+access2
+	This interface reports whether a subject with the specified
+	Smack label has a particular access to an object with a
+	specified Smack label. Write a long format access rule to
+	this file. The next read will indicate whether the access
+	would be permitted. The text will be either "1" indicating
+	access, or "0" indicating denial.
+ambient
+	This contains the Smack label applied to unlabeled network
+	packets.
+change-rule
+	This interface allows modification of existing access control rules.
+	The format accepted on write is:
+		"%s %s %s %s"
+	where the first string is the subject label, the second the
+	object label, the third the access to allow and the fourth the
+	access to deny. The access strings may contain only the characters
+	"rwxat-". If a rule for a given subject and object exists it will be
+	modified by enabling the permissions in the third string and disabling
+	those in the fourth string. If there is no such rule it will be
+	created using the access specified in the third and the fourth strings.
+cipso
+	This interface allows a specific CIPSO header to be assigned
+	to a Smack label. The format accepted on write is:
+		"%24s%4d%4d"["%4d"]...
+	The first string is a fixed Smack label. The first number is
+	the level to use. The second number is the number of categories.
+	The following numbers are the categories.
+	"level-3-cats-5-19          3   2   5  19"
+cipso2
+	This interface allows a specific CIPSO header to be assigned
+	to a Smack label. The format accepted on write is:
+	"%s%4d%4d"["%4d"]...
+	The first string is a long Smack label. The first number is
+	the level to use. The second number is the number of categories.
+	The following numbers are the categories.
+	"level-3-cats-5-19   3   2   5  19"
+direct
+	This contains the CIPSO level used for Smack direct label
+	representation in network packets.
+doi
+	This contains the CIPSO domain of interpretation used in
+	network packets.
+load
+	This interface allows access control rules in addition to
+	the system defined rules to be specified. The format accepted
+	on write is:
+		"%24s%24s%5s"
+	where the first string is the subject label, the second the
+	object label, and the third the requested access. The access
+	string may contain only the characters "rwxat-", and specifies
+	which sort of access is allowed. The "-" is a placeholder for
+	permissions that are not allowed. The string "r-x--" would
+	specify read and execute access. Labels are limited to 23
+	characters in length.
+load2
+	This interface allows access control rules in addition to
+	the system defined rules to be specified. The format accepted
+	on write is:
+		"%s %s %s"
+	where the first string is the subject label, the second the
+	object label, and the third the requested access. The access
+	string may contain only the characters "rwxat-", and specifies
+	which sort of access is allowed. The "-" is a placeholder for
+	permissions that are not allowed. The string "r-x--" would
+	specify read and execute access.
+load-self
+	This interface allows process specific access rules to be
+	defined. These rules are only consulted if access would
+	otherwise be permitted, and are intended to provide additional
+	restrictions on the process. The format is the same as for
+	the load interface.
+load-self2
+	This interface allows process specific access rules to be
+	defined. These rules are only consulted if access would
+	otherwise be permitted, and are intended to provide additional
+	restrictions on the process. The format is the same as for
+	the load2 interface.
+logging
+	This contains the Smack logging state.
+mapped
+	This contains the CIPSO level used for Smack mapped label
+	representation in network packets.
+netlabel
+	This interface allows specific internet addresses to be
+	treated as single label hosts. Packets are sent to single
+	label hosts without CIPSO headers, but only from processes
+	that have Smack write access to the host label. All packets
+	received from single label hosts are given the specified
+	label. The format accepted on write is:
+		"%d.%d.%d.%d label" or "%d.%d.%d.%d/%d label".
+onlycap
+	This contains the label processes must have for CAP_MAC_ADMIN
+	and CAP_MAC_OVERRIDE to be effective. If this file is empty
+	these capabilities are effective at for processes with any
+	label. The value is set by writing the desired label to the
+	file or cleared by writing "-" to the file.
+ptrace
+	This is used to define the current ptrace policy
+	0 - default: this is the policy that relies on Smack access rules.
+	    For the PTRACE_READ a subject needs to have a read access on
+	    object. For the PTRACE_ATTACH a read-write access is required.
+	1 - exact: this is the policy that limits PTRACE_ATTACH. Attach is
+	    only allowed when subject's and object's labels are equal.
+	    PTRACE_READ is not affected. Can be overridden with CAP_SYS_PTRACE.
+	2 - draconian: this policy behaves like the 'exact' above with an
+	    exception that it can't be overridden with CAP_SYS_PTRACE.
+revoke-subject
+	Writing a Smack label here sets the access to '-' for all access
+	rules with that subject label.
+unconfined
+	If the kernel is configured with CONFIG_SECURITY_SMACK_BRINGUP
+	a process with CAP_MAC_ADMIN can write a label into this interface.
+	Thereafter, accesses that involve that label will be logged and
+	the access permitted if it wouldn't be otherwise. Note that this
+	is dangerous and can ruin the proper labeling of your system.
+	It should never be used in production.
+
+You can add access rules in /etc/smack/accesses. They take the form:
+
+    subjectlabel objectlabel access
+
+access is a combination of the letters rwxatb which specify the
+kind of access permitted a subject with subjectlabel on an
+object with objectlabel. If there is no rule no access is allowed.
+
+Look for additional programs on http://schaufler-ca.com
+
+From the Smack Whitepaper:
+
+The Simplified Mandatory Access Control Kernel
+
+Casey Schaufler
+casey@schaufler-ca.com
+
+Mandatory Access Control
+
+Computer systems employ a variety of schemes to constrain how information is
+shared among the people and services using the machine. Some of these schemes
+allow the program or user to decide what other programs or users are allowed
+access to pieces of data. These schemes are called discretionary access
+control mechanisms because the access control is specified at the discretion
+of the user. Other schemes do not leave the decision regarding what a user or
+program can access up to users or programs. These schemes are called mandatory
+access control mechanisms because you don't have a choice regarding the users
+or programs that have access to pieces of data.
+
+Bell & LaPadula
+
+From the middle of the 1980's until the turn of the century Mandatory Access
+Control (MAC) was very closely associated with the Bell & LaPadula security
+model, a mathematical description of the United States Department of Defense
+policy for marking paper documents. MAC in this form enjoyed a following
+within the Capital Beltway and Scandinavian supercomputer centers but was
+often sited as failing to address general needs.
+
+Domain Type Enforcement
+
+Around the turn of the century Domain Type Enforcement (DTE) became popular.
+This scheme organizes users, programs, and data into domains that are
+protected from each other. This scheme has been widely deployed as a component
+of popular Linux distributions. The administrative overhead required to
+maintain this scheme and the detailed understanding of the whole system
+necessary to provide a secure domain mapping leads to the scheme being
+disabled or used in limited ways in the majority of cases.
+
+Smack
+
+Smack is a Mandatory Access Control mechanism designed to provide useful MAC
+while avoiding the pitfalls of its predecessors. The limitations of Bell &
+LaPadula are addressed by providing a scheme whereby access can be controlled
+according to the requirements of the system and its purpose rather than those
+imposed by an arcane government policy. The complexity of Domain Type
+Enforcement and avoided by defining access controls in terms of the access
+modes already in use.
+
+Smack Terminology
+
+The jargon used to talk about Smack will be familiar to those who have dealt
+with other MAC systems and shouldn't be too difficult for the uninitiated to
+pick up. There are four terms that are used in a specific way and that are
+especially important:
+
+	Subject: A subject is an active entity on the computer system.
+	On Smack a subject is a task, which is in turn the basic unit
+	of execution.
+
+	Object: An object is a passive entity on the computer system.
+	On Smack files of all types, IPC, and tasks can be objects.
+
+	Access: Any attempt by a subject to put information into or get
+	information from an object is an access.
+
+	Label: Data that identifies the Mandatory Access Control
+	characteristics of a subject or an object.
+
+These definitions are consistent with the traditional use in the security
+community. There are also some terms from Linux that are likely to crop up:
+
+	Capability: A task that possesses a capability has permission to
+	violate an aspect of the system security policy, as identified by
+	the specific capability. A task that possesses one or more
+	capabilities is a privileged task, whereas a task with no
+	capabilities is an unprivileged task.
+
+	Privilege: A task that is allowed to violate the system security
+	policy is said to have privilege. As of this writing a task can
+	have privilege either by possessing capabilities or by having an
+	effective user of root.
+
+Smack Basics
+
+Smack is an extension to a Linux system. It enforces additional restrictions
+on what subjects can access which objects, based on the labels attached to
+each of the subject and the object.
+
+Labels
+
+Smack labels are ASCII character strings. They can be up to 255 characters
+long, but keeping them to twenty-three characters is recommended.
+Single character labels using special characters, that being anything
+other than a letter or digit, are reserved for use by the Smack development
+team. Smack labels are unstructured, case sensitive, and the only operation
+ever performed on them is comparison for equality. Smack labels cannot
+contain unprintable characters, the "/" (slash), the "\" (backslash), the "'"
+(quote) and '"' (double-quote) characters.
+Smack labels cannot begin with a '-'. This is reserved for special options.
+
+There are some predefined labels:
+
+	_ 	Pronounced "floor", a single underscore character.
+	^ 	Pronounced "hat", a single circumflex character.
+	* 	Pronounced "star", a single asterisk character.
+	? 	Pronounced "huh", a single question mark character.
+	@ 	Pronounced "web", a single at sign character.
+
+Every task on a Smack system is assigned a label. The Smack label
+of a process will usually be assigned by the system initialization
+mechanism.
+
+Access Rules
+
+Smack uses the traditional access modes of Linux. These modes are read,
+execute, write, and occasionally append. There are a few cases where the
+access mode may not be obvious. These include:
+
+	Signals: A signal is a write operation from the subject task to
+	the object task.
+	Internet Domain IPC: Transmission of a packet is considered a
+	write operation from the source task to the destination task.
+
+Smack restricts access based on the label attached to a subject and the label
+attached to the object it is trying to access. The rules enforced are, in
+order:
+
+	1. Any access requested by a task labeled "*" is denied.
+	2. A read or execute access requested by a task labeled "^"
+	   is permitted.
+	3. A read or execute access requested on an object labeled "_"
+	   is permitted.
+	4. Any access requested on an object labeled "*" is permitted.
+	5. Any access requested by a task on an object with the same
+	   label is permitted.
+	6. Any access requested that is explicitly defined in the loaded
+	   rule set is permitted.
+	7. Any other access is denied.
+
+Smack Access Rules
+
+With the isolation provided by Smack access separation is simple. There are
+many interesting cases where limited access by subjects to objects with
+different labels is desired. One example is the familiar spy model of
+sensitivity, where a scientist working on a highly classified project would be
+able to read documents of lower classifications and anything she writes will
+be "born" highly classified. To accommodate such schemes Smack includes a
+mechanism for specifying rules allowing access between labels.
+
+Access Rule Format
+
+The format of an access rule is:
+
+	subject-label object-label access
+
+Where subject-label is the Smack label of the task, object-label is the Smack
+label of the thing being accessed, and access is a string specifying the sort
+of access allowed. The access specification is searched for letters that
+describe access modes:
+
+	a: indicates that append access should be granted.
+	r: indicates that read access should be granted.
+	w: indicates that write access should be granted.
+	x: indicates that execute access should be granted.
+	t: indicates that the rule requests transmutation.
+	b: indicates that the rule should be reported for bring-up.
+
+Uppercase values for the specification letters are allowed as well.
+Access mode specifications can be in any order. Examples of acceptable rules
+are:
+
+	TopSecret Secret  rx
+	Secret    Unclass R
+	Manager   Game    x
+	User      HR      w
+	Snap      Crackle rwxatb
+	New       Old     rRrRr
+	Closed    Off     -
+
+Examples of unacceptable rules are:
+
+	Top Secret Secret     rx
+	Ace        Ace        r
+	Odd        spells     waxbeans
+
+Spaces are not allowed in labels. Since a subject always has access to files
+with the same label specifying a rule for that case is pointless. Only
+valid letters (rwxatbRWXATB) and the dash ('-') character are allowed in
+access specifications. The dash is a placeholder, so "a-r" is the same
+as "ar". A lone dash is used to specify that no access should be allowed.
+
+Applying Access Rules
+
+The developers of Linux rarely define new sorts of things, usually importing
+schemes and concepts from other systems. Most often, the other systems are
+variants of Unix. Unix has many endearing properties, but consistency of
+access control models is not one of them. Smack strives to treat accesses as
+uniformly as is sensible while keeping with the spirit of the underlying
+mechanism.
+
+File system objects including files, directories, named pipes, symbolic links,
+and devices require access permissions that closely match those used by mode
+bit access. To open a file for reading read access is required on the file. To
+search a directory requires execute access. Creating a file with write access
+requires both read and write access on the containing directory. Deleting a
+file requires read and write access to the file and to the containing
+directory. It is possible that a user may be able to see that a file exists
+but not any of its attributes by the circumstance of having read access to the
+containing directory but not to the differently labeled file. This is an
+artifact of the file name being data in the directory, not a part of the file.
+
+If a directory is marked as transmuting (SMACK64TRANSMUTE=TRUE) and the
+access rule that allows a process to create an object in that directory
+includes 't' access the label assigned to the new object will be that
+of the directory, not the creating process. This makes it much easier
+for two processes with different labels to share data without granting
+access to all of their files.
+
+IPC objects, message queues, semaphore sets, and memory segments exist in flat
+namespaces and access requests are only required to match the object in
+question.
+
+Process objects reflect tasks on the system and the Smack label used to access
+them is the same Smack label that the task would use for its own access
+attempts. Sending a signal via the kill() system call is a write operation
+from the signaler to the recipient. Debugging a process requires both reading
+and writing. Creating a new task is an internal operation that results in two
+tasks with identical Smack labels and requires no access checks.
+
+Sockets are data structures attached to processes and sending a packet from
+one process to another requires that the sender have write access to the
+receiver. The receiver is not required to have read access to the sender.
+
+Setting Access Rules
+
+The configuration file /etc/smack/accesses contains the rules to be set at
+system startup. The contents are written to the special file
+/sys/fs/smackfs/load2. Rules can be added at any time and take effect
+immediately. For any pair of subject and object labels there can be only
+one rule, with the most recently specified overriding any earlier
+specification.
+
+Task Attribute
+
+The Smack label of a process can be read from /proc/<pid>/attr/current. A
+process can read its own Smack label from /proc/self/attr/current. A
+privileged process can change its own Smack label by writing to
+/proc/self/attr/current but not the label of another process.
+
+File Attribute
+
+The Smack label of a filesystem object is stored as an extended attribute
+named SMACK64 on the file. This attribute is in the security namespace. It can
+only be changed by a process with privilege.
+
+Privilege
+
+A process with CAP_MAC_OVERRIDE or CAP_MAC_ADMIN is privileged.
+CAP_MAC_OVERRIDE allows the process access to objects it would
+be denied otherwise. CAP_MAC_ADMIN allows a process to change
+Smack data, including rules and attributes.
+
+Smack Networking
+
+As mentioned before, Smack enforces access control on network protocol
+transmissions. Every packet sent by a Smack process is tagged with its Smack
+label. This is done by adding a CIPSO tag to the header of the IP packet. Each
+packet received is expected to have a CIPSO tag that identifies the label and
+if it lacks such a tag the network ambient label is assumed. Before the packet
+is delivered a check is made to determine that a subject with the label on the
+packet has write access to the receiving process and if that is not the case
+the packet is dropped.
+
+CIPSO Configuration
+
+It is normally unnecessary to specify the CIPSO configuration. The default
+values used by the system handle all internal cases. Smack will compose CIPSO
+label values to match the Smack labels being used without administrative
+intervention. Unlabeled packets that come into the system will be given the
+ambient label.
+
+Smack requires configuration in the case where packets from a system that is
+not Smack that speaks CIPSO may be encountered. Usually this will be a Trusted
+Solaris system, but there are other, less widely deployed systems out there.
+CIPSO provides 3 important values, a Domain Of Interpretation (DOI), a level,
+and a category set with each packet. The DOI is intended to identify a group
+of systems that use compatible labeling schemes, and the DOI specified on the
+Smack system must match that of the remote system or packets will be
+discarded. The DOI is 3 by default. The value can be read from
+/sys/fs/smackfs/doi and can be changed by writing to /sys/fs/smackfs/doi.
+
+The label and category set are mapped to a Smack label as defined in
+/etc/smack/cipso.
+
+A Smack/CIPSO mapping has the form:
+
+	smack level [category [category]*]
+
+Smack does not expect the level or category sets to be related in any
+particular way and does not assume or assign accesses based on them. Some
+examples of mappings:
+
+	TopSecret 7
+	TS:A,B    7 1 2
+	SecBDE    5 2 4 6
+	RAFTERS   7 12 26
+
+The ":" and "," characters are permitted in a Smack label but have no special
+meaning.
+
+The mapping of Smack labels to CIPSO values is defined by writing to
+/sys/fs/smackfs/cipso2.
+
+In addition to explicit mappings Smack supports direct CIPSO mappings. One
+CIPSO level is used to indicate that the category set passed in the packet is
+in fact an encoding of the Smack label. The level used is 250 by default. The
+value can be read from /sys/fs/smackfs/direct and changed by writing to
+/sys/fs/smackfs/direct.
+
+Socket Attributes
+
+There are two attributes that are associated with sockets. These attributes
+can only be set by privileged tasks, but any task can read them for their own
+sockets.
+
+	SMACK64IPIN: The Smack label of the task object. A privileged
+	program that will enforce policy may set this to the star label.
+
+	SMACK64IPOUT: The Smack label transmitted with outgoing packets.
+	A privileged program may set this to match the label of another
+	task with which it hopes to communicate.
+
+Smack Netlabel Exceptions
+
+You will often find that your labeled application has to talk to the outside,
+unlabeled world. To do this there's a special file /sys/fs/smackfs/netlabel
+where you can add some exceptions in the form of :
+@IP1	   LABEL1 or
+@IP2/MASK  LABEL2
+
+It means that your application will have unlabeled access to @IP1 if it has
+write access on LABEL1, and access to the subnet @IP2/MASK if it has write
+access on LABEL2.
+
+Entries in the /sys/fs/smackfs/netlabel file are matched by longest mask
+first, like in classless IPv4 routing.
+
+A special label '@' and an option '-CIPSO' can be used there :
+@      means Internet, any application with any label has access to it
+-CIPSO means standard CIPSO networking
+
+If you don't know what CIPSO is and don't plan to use it, you can just do :
+echo 127.0.0.1 -CIPSO > /sys/fs/smackfs/netlabel
+echo 0.0.0.0/0 @      > /sys/fs/smackfs/netlabel
+
+If you use CIPSO on your 192.168.0.0/16 local network and need also unlabeled
+Internet access, you can have :
+echo 127.0.0.1      -CIPSO > /sys/fs/smackfs/netlabel
+echo 192.168.0.0/16 -CIPSO > /sys/fs/smackfs/netlabel
+echo 0.0.0.0/0      @      > /sys/fs/smackfs/netlabel
+
+
+Writing Applications for Smack
+
+There are three sorts of applications that will run on a Smack system. How an
+application interacts with Smack will determine what it will have to do to
+work properly under Smack.
+
+Smack Ignorant Applications
+
+By far the majority of applications have no reason whatever to care about the
+unique properties of Smack. Since invoking a program has no impact on the
+Smack label associated with the process the only concern likely to arise is
+whether the process has execute access to the program.
+
+Smack Relevant Applications
+
+Some programs can be improved by teaching them about Smack, but do not make
+any security decisions themselves. The utility ls(1) is one example of such a
+program.
+
+Smack Enforcing Applications
+
+These are special programs that not only know about Smack, but participate in
+the enforcement of system policy. In most cases these are the programs that
+set up user sessions. There are also network services that provide information
+to processes running with various labels.
+
+File System Interfaces
+
+Smack maintains labels on file system objects using extended attributes. The
+Smack label of a file, directory, or other file system object can be obtained
+using getxattr(2).
+
+	len = getxattr("/", "security.SMACK64", value, sizeof (value));
+
+will put the Smack label of the root directory into value. A privileged
+process can set the Smack label of a file system object with setxattr(2).
+
+	len = strlen("Rubble");
+	rc = setxattr("/foo", "security.SMACK64", "Rubble", len, 0);
+
+will set the Smack label of /foo to "Rubble" if the program has appropriate
+privilege.
+
+Socket Interfaces
+
+The socket attributes can be read using fgetxattr(2).
+
+A privileged process can set the Smack label of outgoing packets with
+fsetxattr(2).
+
+	len = strlen("Rubble");
+	rc = fsetxattr(fd, "security.SMACK64IPOUT", "Rubble", len, 0);
+
+will set the Smack label "Rubble" on packets going out from the socket if the
+program has appropriate privilege.
+
+	rc = fsetxattr(fd, "security.SMACK64IPIN, "*", strlen("*"), 0);
+
+will set the Smack label "*" as the object label against which incoming
+packets will be checked if the program has appropriate privilege.
+
+Administration
+
+Smack supports some mount options:
+
+	smackfsdef=label: specifies the label to give files that lack
+	the Smack label extended attribute.
+
+	smackfsroot=label: specifies the label to assign the root of the
+	file system if it lacks the Smack extended attribute.
+
+	smackfshat=label: specifies a label that must have read access to
+	all labels set on the filesystem. Not yet enforced.
+
+	smackfsfloor=label: specifies a label to which all labels set on the
+	filesystem must have read access. Not yet enforced.
+
+These mount options apply to all file system types.
+
+Smack auditing
+
+If you want Smack auditing of security events, you need to set CONFIG_AUDIT
+in your kernel configuration.
+By default, all denied events will be audited. You can change this behavior by
+writing a single character to the /sys/fs/smackfs/logging file :
+0 : no logging
+1 : log denied (default)
+2 : log accepted
+3 : log denied & accepted
+
+Events are logged as 'key=value' pairs, for each event you at least will get
+the subject, the object, the rights requested, the action, the kernel function
+that triggered the event, plus other pairs depending on the type of event
+audited.
+
+Bringup Mode
+
+Bringup mode provides logging features that can make application
+configuration and system bringup easier. Configure the kernel with
+CONFIG_SECURITY_SMACK_BRINGUP to enable these features. When bringup
+mode is enabled accesses that succeed due to rules marked with the "b"
+access mode will logged. When a new label is introduced for processes
+rules can be added aggressively, marked with the "b". The logging allows
+tracking of which rules actual get used for that label.
+
+Another feature of bringup mode is the "unconfined" option. Writing
+a label to /sys/fs/smackfs/unconfined makes subjects with that label
+able to access any object, and objects with that label accessible to
+all subjects. Any access that is granted because a label is unconfined
+is logged. This feature is dangerous, as files and directories may
+be created in places they couldn't if the policy were being enforced.
diff --git a/kernel/Documentation/security/Yama.txt b/kernel/Documentation/security/Yama.txt
new file mode 100644
index 000000000..227a63f01
--- /dev/null
+++ b/kernel/Documentation/security/Yama.txt
@@ -0,0 +1,73 @@
+Yama is a Linux Security Module that collects a number of system-wide DAC
+security protections that are not handled by the core kernel itself. To
+select it at boot time, specify "security=yama" (though this will disable
+any other LSM).
+
+Yama is controlled through sysctl in /proc/sys/kernel/yama:
+
+- ptrace_scope
+
+==============================================================
+
+ptrace_scope:
+
+As Linux grows in popularity, it will become a larger target for
+malware. One particularly troubling weakness of the Linux process
+interfaces is that a single user is able to examine the memory and
+running state of any of their processes. For example, if one application
+(e.g. Pidgin) was compromised, it would be possible for an attacker to
+attach to other running processes (e.g. Firefox, SSH sessions, GPG agent,
+etc) to extract additional credentials and continue to expand the scope
+of their attack without resorting to user-assisted phishing.
+
+This is not a theoretical problem. SSH session hijacking
+(http://www.storm.net.nz/projects/7) and arbitrary code injection
+(http://c-skills.blogspot.com/2007/05/injectso.html) attacks already
+exist and remain possible if ptrace is allowed to operate as before.
+Since ptrace is not commonly used by non-developers and non-admins, system
+builders should be allowed the option to disable this debugging system.
+
+For a solution, some applications use prctl(PR_SET_DUMPABLE, ...) to
+specifically disallow such ptrace attachment (e.g. ssh-agent), but many
+do not. A more general solution is to only allow ptrace directly from a
+parent to a child process (i.e. direct "gdb EXE" and "strace EXE" still
+work), or with CAP_SYS_PTRACE (i.e. "gdb --pid=PID", and "strace -p PID"
+still work as root).
+
+In mode 1, software that has defined application-specific relationships
+between a debugging process and its inferior (crash handlers, etc),
+prctl(PR_SET_PTRACER, pid, ...) can be used. An inferior can declare which
+other process (and its descendants) are allowed to call PTRACE_ATTACH
+against it. Only one such declared debugging process can exists for
+each inferior at a time. For example, this is used by KDE, Chromium, and
+Firefox's crash handlers, and by Wine for allowing only Wine processes
+to ptrace each other. If a process wishes to entirely disable these ptrace
+restrictions, it can call prctl(PR_SET_PTRACER, PR_SET_PTRACER_ANY, ...)
+so that any otherwise allowed process (even those in external pid namespaces)
+may attach.
+
+The sysctl settings (writable only with CAP_SYS_PTRACE) are:
+
+0 - classic ptrace permissions: a process can PTRACE_ATTACH to any other
+    process running under the same uid, as long as it is dumpable (i.e.
+    did not transition uids, start privileged, or have called
+    prctl(PR_SET_DUMPABLE...) already). Similarly, PTRACE_TRACEME is
+    unchanged.
+
+1 - restricted ptrace: a process must have a predefined relationship
+    with the inferior it wants to call PTRACE_ATTACH on. By default,
+    this relationship is that of only its descendants when the above
+    classic criteria is also met. To change the relationship, an
+    inferior can call prctl(PR_SET_PTRACER, debugger, ...) to declare
+    an allowed debugger PID to call PTRACE_ATTACH on the inferior.
+    Using PTRACE_TRACEME is unchanged.
+
+2 - admin-only attach: only processes with CAP_SYS_PTRACE may use ptrace
+    with PTRACE_ATTACH, or through children calling PTRACE_TRACEME.
+
+3 - no attach: no processes may use ptrace with PTRACE_ATTACH nor via
+    PTRACE_TRACEME. Once set, this sysctl value cannot be changed.
+
+The original children-only logic was based on the restrictions in grsecurity.
+
+==============================================================
diff --git a/kernel/Documentation/security/apparmor.txt b/kernel/Documentation/security/apparmor.txt
new file mode 100644
index 000000000..93c1fd7d0
--- /dev/null
+++ b/kernel/Documentation/security/apparmor.txt
@@ -0,0 +1,39 @@
+--- What is AppArmor? ---
+
+AppArmor is MAC style security extension for the Linux kernel.  It implements
+a task centered policy, with task "profiles" being created and loaded
+from user space.  Tasks on the system that do not have a profile defined for
+them run in an unconfined state which is equivalent to standard Linux DAC
+permissions.
+
+--- How to enable/disable ---
+
+set CONFIG_SECURITY_APPARMOR=y
+
+If AppArmor should be selected as the default security module then
+   set CONFIG_DEFAULT_SECURITY="apparmor"
+   and CONFIG_SECURITY_APPARMOR_BOOTPARAM_VALUE=1
+
+Build the kernel
+
+If AppArmor is not the default security module it can be enabled by passing
+security=apparmor on the kernel's command line.
+
+If AppArmor is the default security module it can be disabled by passing
+apparmor=0, security=XXXX (where XXX is valid security module), on the
+kernel's command line
+
+For AppArmor to enforce any restrictions beyond standard Linux DAC permissions
+policy must be loaded into the kernel from user space (see the Documentation
+and tools links).
+
+--- Documentation ---
+
+Documentation can be found on the wiki.
+
+--- Links ---
+
+Mailing List - apparmor@lists.ubuntu.com
+Wiki - http://apparmor.wiki.kernel.org/
+User space tools - https://launchpad.net/apparmor
+Kernel module - git://git.kernel.org/pub/scm/linux/kernel/git/jj/apparmor-dev.git
diff --git a/kernel/Documentation/security/credentials.txt b/kernel/Documentation/security/credentials.txt
new file mode 100644
index 000000000..86257052e
--- /dev/null
+++ b/kernel/Documentation/security/credentials.txt
@@ -0,0 +1,581 @@
+			     ====================
+			     CREDENTIALS IN LINUX
+			     ====================
+
+By: David Howells <dhowells@redhat.com>
+
+Contents:
+
+ (*) Overview.
+
+ (*) Types of credentials.
+
+ (*) File markings.
+
+ (*) Task credentials.
+
+     - Immutable credentials.
+     - Accessing task credentials.
+     - Accessing another task's credentials.
+     - Altering credentials.
+     - Managing credentials.
+
+ (*) Open file credentials.
+
+ (*) Overriding the VFS's use of credentials.
+
+
+========
+OVERVIEW
+========
+
+There are several parts to the security check performed by Linux when one
+object acts upon another:
+
+ (1) Objects.
+
+     Objects are things in the system that may be acted upon directly by
+     userspace programs.  Linux has a variety of actionable objects, including:
+
+	- Tasks
+	- Files/inodes
+	- Sockets
+	- Message queues
+	- Shared memory segments
+	- Semaphores
+	- Keys
+
+     As a part of the description of all these objects there is a set of
+     credentials.  What's in the set depends on the type of object.
+
+ (2) Object ownership.
+
+     Amongst the credentials of most objects, there will be a subset that
+     indicates the ownership of that object.  This is used for resource
+     accounting and limitation (disk quotas and task rlimits for example).
+
+     In a standard UNIX filesystem, for instance, this will be defined by the
+     UID marked on the inode.
+
+ (3) The objective context.
+
+     Also amongst the credentials of those objects, there will be a subset that
+     indicates the 'objective context' of that object.  This may or may not be
+     the same set as in (2) - in standard UNIX files, for instance, this is the
+     defined by the UID and the GID marked on the inode.
+
+     The objective context is used as part of the security calculation that is
+     carried out when an object is acted upon.
+
+ (4) Subjects.
+
+     A subject is an object that is acting upon another object.
+
+     Most of the objects in the system are inactive: they don't act on other
+     objects within the system.  Processes/tasks are the obvious exception:
+     they do stuff; they access and manipulate things.
+
+     Objects other than tasks may under some circumstances also be subjects.
+     For instance an open file may send SIGIO to a task using the UID and EUID
+     given to it by a task that called fcntl(F_SETOWN) upon it.  In this case,
+     the file struct will have a subjective context too.
+
+ (5) The subjective context.
+
+     A subject has an additional interpretation of its credentials.  A subset
+     of its credentials forms the 'subjective context'.  The subjective context
+     is used as part of the security calculation that is carried out when a
+     subject acts.
+
+     A Linux task, for example, has the FSUID, FSGID and the supplementary
+     group list for when it is acting upon a file - which are quite separate
+     from the real UID and GID that normally form the objective context of the
+     task.
+
+ (6) Actions.
+
+     Linux has a number of actions available that a subject may perform upon an
+     object.  The set of actions available depends on the nature of the subject
+     and the object.
+
+     Actions include reading, writing, creating and deleting files; forking or
+     signalling and tracing tasks.
+
+ (7) Rules, access control lists and security calculations.
+
+     When a subject acts upon an object, a security calculation is made.  This
+     involves taking the subjective context, the objective context and the
+     action, and searching one or more sets of rules to see whether the subject
+     is granted or denied permission to act in the desired manner on the
+     object, given those contexts.
+
+     There are two main sources of rules:
+
+     (a) Discretionary access control (DAC):
+
+	 Sometimes the object will include sets of rules as part of its
+	 description.  This is an 'Access Control List' or 'ACL'.  A Linux
+	 file may supply more than one ACL.
+
+	 A traditional UNIX file, for example, includes a permissions mask that
+	 is an abbreviated ACL with three fixed classes of subject ('user',
+	 'group' and 'other'), each of which may be granted certain privileges
+	 ('read', 'write' and 'execute' - whatever those map to for the object
+	 in question).  UNIX file permissions do not allow the arbitrary
+	 specification of subjects, however, and so are of limited use.
+
+	 A Linux file might also sport a POSIX ACL.  This is a list of rules
+	 that grants various permissions to arbitrary subjects.
+
+     (b) Mandatory access control (MAC):
+
+	 The system as a whole may have one or more sets of rules that get
+	 applied to all subjects and objects, regardless of their source.
+	 SELinux and Smack are examples of this.
+
+	 In the case of SELinux and Smack, each object is given a label as part
+	 of its credentials.  When an action is requested, they take the
+	 subject label, the object label and the action and look for a rule
+	 that says that this action is either granted or denied.
+
+
+====================
+TYPES OF CREDENTIALS
+====================
+
+The Linux kernel supports the following types of credentials:
+
+ (1) Traditional UNIX credentials.
+
+	Real User ID
+	Real Group ID
+
+     The UID and GID are carried by most, if not all, Linux objects, even if in
+     some cases it has to be invented (FAT or CIFS files for example, which are
+     derived from Windows).  These (mostly) define the objective context of
+     that object, with tasks being slightly different in some cases.
+
+	Effective, Saved and FS User ID
+	Effective, Saved and FS Group ID
+	Supplementary groups
+
+     These are additional credentials used by tasks only.  Usually, an
+     EUID/EGID/GROUPS will be used as the subjective context, and real UID/GID
+     will be used as the objective.  For tasks, it should be noted that this is
+     not always true.
+
+ (2) Capabilities.
+
+	Set of permitted capabilities
+	Set of inheritable capabilities
+	Set of effective capabilities
+	Capability bounding set
+
+     These are only carried by tasks.  They indicate superior capabilities
+     granted piecemeal to a task that an ordinary task wouldn't otherwise have.
+     These are manipulated implicitly by changes to the traditional UNIX
+     credentials, but can also be manipulated directly by the capset() system
+     call.
+
+     The permitted capabilities are those caps that the process might grant
+     itself to its effective or permitted sets through capset().  This
+     inheritable set might also be so constrained.
+
+     The effective capabilities are the ones that a task is actually allowed to
+     make use of itself.
+
+     The inheritable capabilities are the ones that may get passed across
+     execve().
+
+     The bounding set limits the capabilities that may be inherited across
+     execve(), especially when a binary is executed that will execute as UID 0.
+
+ (3) Secure management flags (securebits).
+
+     These are only carried by tasks.  These govern the way the above
+     credentials are manipulated and inherited over certain operations such as
+     execve().  They aren't used directly as objective or subjective
+     credentials.
+
+ (4) Keys and keyrings.
+
+     These are only carried by tasks.  They carry and cache security tokens
+     that don't fit into the other standard UNIX credentials.  They are for
+     making such things as network filesystem keys available to the file
+     accesses performed by processes, without the necessity of ordinary
+     programs having to know about security details involved.
+
+     Keyrings are a special type of key.  They carry sets of other keys and can
+     be searched for the desired key.  Each process may subscribe to a number
+     of keyrings:
+
+	Per-thread keying
+	Per-process keyring
+	Per-session keyring
+
+     When a process accesses a key, if not already present, it will normally be
+     cached on one of these keyrings for future accesses to find.
+
+     For more information on using keys, see Documentation/security/keys.txt.
+
+ (5) LSM
+
+     The Linux Security Module allows extra controls to be placed over the
+     operations that a task may do.  Currently Linux supports several LSM
+     options.
+
+     Some work by labelling the objects in a system and then applying sets of
+     rules (policies) that say what operations a task with one label may do to
+     an object with another label.
+
+ (6) AF_KEY
+
+     This is a socket-based approach to credential management for networking
+     stacks [RFC 2367].  It isn't discussed by this document as it doesn't
+     interact directly with task and file credentials; rather it keeps system
+     level credentials.
+
+
+When a file is opened, part of the opening task's subjective context is
+recorded in the file struct created.  This allows operations using that file
+struct to use those credentials instead of the subjective context of the task
+that issued the operation.  An example of this would be a file opened on a
+network filesystem where the credentials of the opened file should be presented
+to the server, regardless of who is actually doing a read or a write upon it.
+
+
+=============
+FILE MARKINGS
+=============
+
+Files on disk or obtained over the network may have annotations that form the
+objective security context of that file.  Depending on the type of filesystem,
+this may include one or more of the following:
+
+ (*) UNIX UID, GID, mode;
+
+ (*) Windows user ID;
+
+ (*) Access control list;
+
+ (*) LSM security label;
+
+ (*) UNIX exec privilege escalation bits (SUID/SGID);
+
+ (*) File capabilities exec privilege escalation bits.
+
+These are compared to the task's subjective security context, and certain
+operations allowed or disallowed as a result.  In the case of execve(), the
+privilege escalation bits come into play, and may allow the resulting process
+extra privileges, based on the annotations on the executable file.
+
+
+================
+TASK CREDENTIALS
+================
+
+In Linux, all of a task's credentials are held in (uid, gid) or through
+(groups, keys, LSM security) a refcounted structure of type 'struct cred'.
+Each task points to its credentials by a pointer called 'cred' in its
+task_struct.
+
+Once a set of credentials has been prepared and committed, it may not be
+changed, barring the following exceptions:
+
+ (1) its reference count may be changed;
+
+ (2) the reference count on the group_info struct it points to may be changed;
+
+ (3) the reference count on the security data it points to may be changed;
+
+ (4) the reference count on any keyrings it points to may be changed;
+
+ (5) any keyrings it points to may be revoked, expired or have their security
+     attributes changed; and
+
+ (6) the contents of any keyrings to which it points may be changed (the whole
+     point of keyrings being a shared set of credentials, modifiable by anyone
+     with appropriate access).
+
+To alter anything in the cred struct, the copy-and-replace principle must be
+adhered to.  First take a copy, then alter the copy and then use RCU to change
+the task pointer to make it point to the new copy.  There are wrappers to aid
+with this (see below).
+
+A task may only alter its _own_ credentials; it is no longer permitted for a
+task to alter another's credentials.  This means the capset() system call is no
+longer permitted to take any PID other than the one of the current process.
+Also keyctl_instantiate() and keyctl_negate() functions no longer permit
+attachment to process-specific keyrings in the requesting process as the
+instantiating process may need to create them.
+
+
+IMMUTABLE CREDENTIALS
+---------------------
+
+Once a set of credentials has been made public (by calling commit_creds() for
+example), it must be considered immutable, barring two exceptions:
+
+ (1) The reference count may be altered.
+
+ (2) Whilst the keyring subscriptions of a set of credentials may not be
+     changed, the keyrings subscribed to may have their contents altered.
+
+To catch accidental credential alteration at compile time, struct task_struct
+has _const_ pointers to its credential sets, as does struct file.  Furthermore,
+certain functions such as get_cred() and put_cred() operate on const pointers,
+thus rendering casts unnecessary, but require to temporarily ditch the const
+qualification to be able to alter the reference count.
+
+
+ACCESSING TASK CREDENTIALS
+--------------------------
+
+A task being able to alter only its own credentials permits the current process
+to read or replace its own credentials without the need for any form of locking
+- which simplifies things greatly.  It can just call:
+
+	const struct cred *current_cred()
+
+to get a pointer to its credentials structure, and it doesn't have to release
+it afterwards.
+
+There are convenience wrappers for retrieving specific aspects of a task's
+credentials (the value is simply returned in each case):
+
+	uid_t current_uid(void)		Current's real UID
+	gid_t current_gid(void)		Current's real GID
+	uid_t current_euid(void)	Current's effective UID
+	gid_t current_egid(void)	Current's effective GID
+	uid_t current_fsuid(void)	Current's file access UID
+	gid_t current_fsgid(void)	Current's file access GID
+	kernel_cap_t current_cap(void)	Current's effective capabilities
+	void *current_security(void)	Current's LSM security pointer
+	struct user_struct *current_user(void)  Current's user account
+
+There are also convenience wrappers for retrieving specific associated pairs of
+a task's credentials:
+
+	void current_uid_gid(uid_t *, gid_t *);
+	void current_euid_egid(uid_t *, gid_t *);
+	void current_fsuid_fsgid(uid_t *, gid_t *);
+
+which return these pairs of values through their arguments after retrieving
+them from the current task's credentials.
+
+
+In addition, there is a function for obtaining a reference on the current
+process's current set of credentials:
+
+	const struct cred *get_current_cred(void);
+
+and functions for getting references to one of the credentials that don't
+actually live in struct cred:
+
+	struct user_struct *get_current_user(void);
+	struct group_info *get_current_groups(void);
+
+which get references to the current process's user accounting structure and
+supplementary groups list respectively.
+
+Once a reference has been obtained, it must be released with put_cred(),
+free_uid() or put_group_info() as appropriate.
+
+
+ACCESSING ANOTHER TASK'S CREDENTIALS
+------------------------------------
+
+Whilst a task may access its own credentials without the need for locking, the
+same is not true of a task wanting to access another task's credentials.  It
+must use the RCU read lock and rcu_dereference().
+
+The rcu_dereference() is wrapped by:
+
+	const struct cred *__task_cred(struct task_struct *task);
+
+This should be used inside the RCU read lock, as in the following example:
+
+	void foo(struct task_struct *t, struct foo_data *f)
+	{
+		const struct cred *tcred;
+		...
+		rcu_read_lock();
+		tcred = __task_cred(t);
+		f->uid = tcred->uid;
+		f->gid = tcred->gid;
+		f->groups = get_group_info(tcred->groups);
+		rcu_read_unlock();
+		...
+	}
+
+Should it be necessary to hold another task's credentials for a long period of
+time, and possibly to sleep whilst doing so, then the caller should get a
+reference on them using:
+
+	const struct cred *get_task_cred(struct task_struct *task);
+
+This does all the RCU magic inside of it.  The caller must call put_cred() on
+the credentials so obtained when they're finished with.
+
+ [*] Note: The result of __task_cred() should not be passed directly to
+     get_cred() as this may race with commit_cred().
+
+There are a couple of convenience functions to access bits of another task's
+credentials, hiding the RCU magic from the caller:
+
+	uid_t task_uid(task)		Task's real UID
+	uid_t task_euid(task)		Task's effective UID
+
+If the caller is holding the RCU read lock at the time anyway, then:
+
+	__task_cred(task)->uid
+	__task_cred(task)->euid
+
+should be used instead.  Similarly, if multiple aspects of a task's credentials
+need to be accessed, RCU read lock should be used, __task_cred() called, the
+result stored in a temporary pointer and then the credential aspects called
+from that before dropping the lock.  This prevents the potentially expensive
+RCU magic from being invoked multiple times.
+
+Should some other single aspect of another task's credentials need to be
+accessed, then this can be used:
+
+	task_cred_xxx(task, member)
+
+where 'member' is a non-pointer member of the cred struct.  For instance:
+
+	uid_t task_cred_xxx(task, suid);
+
+will retrieve 'struct cred::suid' from the task, doing the appropriate RCU
+magic.  This may not be used for pointer members as what they point to may
+disappear the moment the RCU read lock is dropped.
+
+
+ALTERING CREDENTIALS
+--------------------
+
+As previously mentioned, a task may only alter its own credentials, and may not
+alter those of another task.  This means that it doesn't need to use any
+locking to alter its own credentials.
+
+To alter the current process's credentials, a function should first prepare a
+new set of credentials by calling:
+
+	struct cred *prepare_creds(void);
+
+this locks current->cred_replace_mutex and then allocates and constructs a
+duplicate of the current process's credentials, returning with the mutex still
+held if successful.  It returns NULL if not successful (out of memory).
+
+The mutex prevents ptrace() from altering the ptrace state of a process whilst
+security checks on credentials construction and changing is taking place as
+the ptrace state may alter the outcome, particularly in the case of execve().
+
+The new credentials set should be altered appropriately, and any security
+checks and hooks done.  Both the current and the proposed sets of credentials
+are available for this purpose as current_cred() will return the current set
+still at this point.
+
+
+When the credential set is ready, it should be committed to the current process
+by calling:
+
+	int commit_creds(struct cred *new);
+
+This will alter various aspects of the credentials and the process, giving the
+LSM a chance to do likewise, then it will use rcu_assign_pointer() to actually
+commit the new credentials to current->cred, it will release
+current->cred_replace_mutex to allow ptrace() to take place, and it will notify
+the scheduler and others of the changes.
+
+This function is guaranteed to return 0, so that it can be tail-called at the
+end of such functions as sys_setresuid().
+
+Note that this function consumes the caller's reference to the new credentials.
+The caller should _not_ call put_cred() on the new credentials afterwards.
+
+Furthermore, once this function has been called on a new set of credentials,
+those credentials may _not_ be changed further.
+
+
+Should the security checks fail or some other error occur after prepare_creds()
+has been called, then the following function should be invoked:
+
+	void abort_creds(struct cred *new);
+
+This releases the lock on current->cred_replace_mutex that prepare_creds() got
+and then releases the new credentials.
+
+
+A typical credentials alteration function would look something like this:
+
+	int alter_suid(uid_t suid)
+	{
+		struct cred *new;
+		int ret;
+
+		new = prepare_creds();
+		if (!new)
+			return -ENOMEM;
+
+		new->suid = suid;
+		ret = security_alter_suid(new);
+		if (ret < 0) {
+			abort_creds(new);
+			return ret;
+		}
+
+		return commit_creds(new);
+	}
+
+
+MANAGING CREDENTIALS
+--------------------
+
+There are some functions to help manage credentials:
+
+ (*) void put_cred(const struct cred *cred);
+
+     This releases a reference to the given set of credentials.  If the
+     reference count reaches zero, the credentials will be scheduled for
+     destruction by the RCU system.
+
+ (*) const struct cred *get_cred(const struct cred *cred);
+
+     This gets a reference on a live set of credentials, returning a pointer to
+     that set of credentials.
+
+ (*) struct cred *get_new_cred(struct cred *cred);
+
+     This gets a reference on a set of credentials that is under construction
+     and is thus still mutable, returning a pointer to that set of credentials.
+
+
+=====================
+OPEN FILE CREDENTIALS
+=====================
+
+When a new file is opened, a reference is obtained on the opening task's
+credentials and this is attached to the file struct as 'f_cred' in place of
+'f_uid' and 'f_gid'.  Code that used to access file->f_uid and file->f_gid
+should now access file->f_cred->fsuid and file->f_cred->fsgid.
+
+It is safe to access f_cred without the use of RCU or locking because the
+pointer will not change over the lifetime of the file struct, and nor will the
+contents of the cred struct pointed to, barring the exceptions listed above
+(see the Task Credentials section).
+
+
+=======================================
+OVERRIDING THE VFS'S USE OF CREDENTIALS
+=======================================
+
+Under some circumstances it is desirable to override the credentials used by
+the VFS, and that can be done by calling into such as vfs_mkdir() with a
+different set of credentials.  This is done in the following places:
+
+ (*) sys_faccessat().
+
+ (*) do_coredump().
+
+ (*) nfs4recover.c.
diff --git a/kernel/Documentation/security/keys-ecryptfs.txt b/kernel/Documentation/security/keys-ecryptfs.txt
new file mode 100644
index 000000000..c3bbeba63
--- /dev/null
+++ b/kernel/Documentation/security/keys-ecryptfs.txt
@@ -0,0 +1,68 @@
+		Encrypted keys for the eCryptfs filesystem
+
+ECryptfs is a stacked filesystem which transparently encrypts and decrypts each
+file using a randomly generated File Encryption Key (FEK).
+
+Each FEK is in turn encrypted with a File Encryption Key Encryption Key (FEFEK)
+either in kernel space or in user space with a daemon called 'ecryptfsd'.  In
+the former case the operation is performed directly by the kernel CryptoAPI
+using a key, the FEFEK, derived from a user prompted passphrase;  in the latter
+the FEK is encrypted by 'ecryptfsd' with the help of external libraries in order
+to support other mechanisms like public key cryptography, PKCS#11 and TPM based
+operations.
+
+The data structure defined by eCryptfs to contain information required for the
+FEK decryption is called authentication token and, currently, can be stored in a
+kernel key of the 'user' type, inserted in the user's session specific keyring
+by the userspace utility 'mount.ecryptfs' shipped with the package
+'ecryptfs-utils'.
+
+The 'encrypted' key type has been extended with the introduction of the new
+format 'ecryptfs' in order to be used in conjunction with the eCryptfs
+filesystem.  Encrypted keys of the newly introduced format store an
+authentication token in its payload with a FEFEK randomly generated by the
+kernel and protected by the parent master key.
+
+In order to avoid known-plaintext attacks, the datablob obtained through
+commands 'keyctl print' or 'keyctl pipe' does not contain the overall
+authentication token, which content is well known, but only the FEFEK in
+encrypted form.
+
+The eCryptfs filesystem may really benefit from using encrypted keys in that the
+required key can be securely generated by an Administrator and provided at boot
+time after the unsealing of a 'trusted' key in order to perform the mount in a
+controlled environment.  Another advantage is that the key is not exposed to
+threats of malicious software, because it is available in clear form only at
+kernel level.
+
+Usage:
+   keyctl add encrypted name "new ecryptfs key-type:master-key-name keylen" ring
+   keyctl add encrypted name "load hex_blob" ring
+   keyctl update keyid "update key-type:master-key-name"
+
+name:= '<16 hexadecimal characters>'
+key-type:= 'trusted' | 'user'
+keylen:= 64
+
+
+Example of encrypted key usage with the eCryptfs filesystem:
+
+Create an encrypted key "1000100010001000" of length 64 bytes with format
+'ecryptfs' and save it using a previously loaded user key "test":
+
+    $ keyctl add encrypted 1000100010001000 "new ecryptfs user:test 64" @u
+    19184530
+
+    $ keyctl print 19184530
+    ecryptfs user:test 64 490045d4bfe48c99f0d465fbbbb79e7500da954178e2de0697
+    dd85091f5450a0511219e9f7cd70dcd498038181466f78ac8d4c19504fcc72402bfc41c2
+    f253a41b7507ccaa4b2b03fff19a69d1cc0b16e71746473f023a95488b6edfd86f7fdd40
+    9d292e4bacded1258880122dd553a661
+
+    $ keyctl pipe 19184530 > ecryptfs.blob
+
+Mount an eCryptfs filesystem using the created encrypted key "1000100010001000"
+into the '/secret' directory:
+
+    $ mount -i -t ecryptfs -oecryptfs_sig=1000100010001000,\
+      ecryptfs_cipher=aes,ecryptfs_key_bytes=32 /secret /secret
diff --git a/kernel/Documentation/security/keys-request-key.txt b/kernel/Documentation/security/keys-request-key.txt
new file mode 100644
index 000000000..51987bfec
--- /dev/null
+++ b/kernel/Documentation/security/keys-request-key.txt
@@ -0,0 +1,202 @@
+			      ===================
+			      KEY REQUEST SERVICE
+			      ===================
+
+The key request service is part of the key retention service (refer to
+Documentation/security/keys.txt).  This document explains more fully how
+the requesting algorithm works.
+
+The process starts by either the kernel requesting a service by calling
+request_key*():
+
+	struct key *request_key(const struct key_type *type,
+				const char *description,
+				const char *callout_info);
+
+or:
+
+	struct key *request_key_with_auxdata(const struct key_type *type,
+					     const char *description,
+					     const char *callout_info,
+					     size_t callout_len,
+					     void *aux);
+
+or:
+
+	struct key *request_key_async(const struct key_type *type,
+				      const char *description,
+				      const char *callout_info,
+				      size_t callout_len);
+
+or:
+
+	struct key *request_key_async_with_auxdata(const struct key_type *type,
+						   const char *description,
+						   const char *callout_info,
+					     	   size_t callout_len,
+						   void *aux);
+
+Or by userspace invoking the request_key system call:
+
+	key_serial_t request_key(const char *type,
+				 const char *description,
+				 const char *callout_info,
+				 key_serial_t dest_keyring);
+
+The main difference between the access points is that the in-kernel interface
+does not need to link the key to a keyring to prevent it from being immediately
+destroyed.  The kernel interface returns a pointer directly to the key, and
+it's up to the caller to destroy the key.
+
+The request_key*_with_auxdata() calls are like the in-kernel request_key*()
+calls, except that they permit auxiliary data to be passed to the upcaller (the
+default is NULL).  This is only useful for those key types that define their
+own upcall mechanism rather than using /sbin/request-key.
+
+The two async in-kernel calls may return keys that are still in the process of
+being constructed.  The two non-async ones will wait for construction to
+complete first.
+
+The userspace interface links the key to a keyring associated with the process
+to prevent the key from going away, and returns the serial number of the key to
+the caller.
+
+
+The following example assumes that the key types involved don't define their
+own upcall mechanisms.  If they do, then those should be substituted for the
+forking and execution of /sbin/request-key.
+
+
+===========
+THE PROCESS
+===========
+
+A request proceeds in the following manner:
+
+ (1) Process A calls request_key() [the userspace syscall calls the kernel
+     interface].
+
+ (2) request_key() searches the process's subscribed keyrings to see if there's
+     a suitable key there.  If there is, it returns the key.  If there isn't,
+     and callout_info is not set, an error is returned.  Otherwise the process
+     proceeds to the next step.
+
+ (3) request_key() sees that A doesn't have the desired key yet, so it creates
+     two things:
+
+     (a) An uninstantiated key U of requested type and description.
+
+     (b) An authorisation key V that refers to key U and notes that process A
+     	 is the context in which key U should be instantiated and secured, and
+     	 from which associated key requests may be satisfied.
+
+ (4) request_key() then forks and executes /sbin/request-key with a new session
+     keyring that contains a link to auth key V.
+
+ (5) /sbin/request-key assumes the authority associated with key U.
+
+ (6) /sbin/request-key execs an appropriate program to perform the actual
+     instantiation.
+
+ (7) The program may want to access another key from A's context (say a
+     Kerberos TGT key).  It just requests the appropriate key, and the keyring
+     search notes that the session keyring has auth key V in its bottom level.
+
+     This will permit it to then search the keyrings of process A with the
+     UID, GID, groups and security info of process A as if it was process A,
+     and come up with key W.
+
+ (8) The program then does what it must to get the data with which to
+     instantiate key U, using key W as a reference (perhaps it contacts a
+     Kerberos server using the TGT) and then instantiates key U.
+
+ (9) Upon instantiating key U, auth key V is automatically revoked so that it
+     may not be used again.
+
+(10) The program then exits 0 and request_key() deletes key V and returns key
+     U to the caller.
+
+This also extends further.  If key W (step 7 above) didn't exist, key W would
+be created uninstantiated, another auth key (X) would be created (as per step
+3) and another copy of /sbin/request-key spawned (as per step 4); but the
+context specified by auth key X will still be process A, as it was in auth key
+V.
+
+This is because process A's keyrings can't simply be attached to
+/sbin/request-key at the appropriate places because (a) execve will discard two
+of them, and (b) it requires the same UID/GID/Groups all the way through.
+
+
+====================================
+NEGATIVE INSTANTIATION AND REJECTION
+====================================
+
+Rather than instantiating a key, it is possible for the possessor of an
+authorisation key to negatively instantiate a key that's under construction.
+This is a short duration placeholder that causes any attempt at re-requesting
+the key whilst it exists to fail with error ENOKEY if negated or the specified
+error if rejected.
+
+This is provided to prevent excessive repeated spawning of /sbin/request-key
+processes for a key that will never be obtainable.
+
+Should the /sbin/request-key process exit anything other than 0 or die on a
+signal, the key under construction will be automatically negatively
+instantiated for a short amount of time.
+
+
+====================
+THE SEARCH ALGORITHM
+====================
+
+A search of any particular keyring proceeds in the following fashion:
+
+ (1) When the key management code searches for a key (keyring_search_aux) it
+     firstly calls key_permission(SEARCH) on the keyring it's starting with,
+     if this denies permission, it doesn't search further.
+
+ (2) It considers all the non-keyring keys within that keyring and, if any key
+     matches the criteria specified, calls key_permission(SEARCH) on it to see
+     if the key is allowed to be found.  If it is, that key is returned; if
+     not, the search continues, and the error code is retained if of higher
+     priority than the one currently set.
+
+ (3) It then considers all the keyring-type keys in the keyring it's currently
+     searching.  It calls key_permission(SEARCH) on each keyring, and if this
+     grants permission, it recurses, executing steps (2) and (3) on that
+     keyring.
+
+The process stops immediately a valid key is found with permission granted to
+use it.  Any error from a previous match attempt is discarded and the key is
+returned.
+
+When search_process_keyrings() is invoked, it performs the following searches
+until one succeeds:
+
+ (1) If extant, the process's thread keyring is searched.
+
+ (2) If extant, the process's process keyring is searched.
+
+ (3) The process's session keyring is searched.
+
+ (4) If the process has assumed the authority associated with a request_key()
+     authorisation key then:
+
+     (a) If extant, the calling process's thread keyring is searched.
+
+     (b) If extant, the calling process's process keyring is searched.
+
+     (c) The calling process's session keyring is searched.
+
+The moment one succeeds, all pending errors are discarded and the found key is
+returned.
+
+Only if all these fail does the whole thing fail with the highest priority
+error.  Note that several errors may have come from LSM.
+
+The error priority is:
+
+	EKEYREVOKED > EKEYEXPIRED > ENOKEY
+
+EACCES/EPERM are only returned on a direct search of a specific keyring where
+the basal keyring does not grant Search permission.
diff --git a/kernel/Documentation/security/keys-trusted-encrypted.txt b/kernel/Documentation/security/keys-trusted-encrypted.txt
new file mode 100644
index 000000000..e105ae97a
--- /dev/null
+++ b/kernel/Documentation/security/keys-trusted-encrypted.txt
@@ -0,0 +1,160 @@
+			Trusted and Encrypted Keys
+
+Trusted and Encrypted Keys are two new key types added to the existing kernel
+key ring service.  Both of these new types are variable length symmetric keys,
+and in both cases all keys are created in the kernel, and user space sees,
+stores, and loads only encrypted blobs.  Trusted Keys require the availability
+of a Trusted Platform Module (TPM) chip for greater security, while Encrypted
+Keys can be used on any system.  All user level blobs, are displayed and loaded
+in hex ascii for convenience, and are integrity verified.
+
+Trusted Keys use a TPM both to generate and to seal the keys.  Keys are sealed
+under a 2048 bit RSA key in the TPM, and optionally sealed to specified PCR
+(integrity measurement) values, and only unsealed by the TPM, if PCRs and blob
+integrity verifications match.  A loaded Trusted Key can be updated with new
+(future) PCR values, so keys are easily migrated to new pcr values, such as
+when the kernel and initramfs are updated.  The same key can have many saved
+blobs under different PCR values, so multiple boots are easily supported.
+
+By default, trusted keys are sealed under the SRK, which has the default
+authorization value (20 zeros).  This can be set at takeownership time with the
+trouser's utility: "tpm_takeownership -u -z".
+
+Usage:
+    keyctl add trusted name "new keylen [options]" ring
+    keyctl add trusted name "load hex_blob [pcrlock=pcrnum]" ring
+    keyctl update key "update [options]"
+    keyctl print keyid
+
+    options:
+       keyhandle= ascii hex value of sealing key default 0x40000000 (SRK)
+       keyauth=	  ascii hex auth for sealing key default 0x00...i
+		  (40 ascii zeros)
+       blobauth=  ascii hex auth for sealed data default 0x00...
+		  (40 ascii zeros)
+       blobauth=  ascii hex auth for sealed data default 0x00...
+		  (40 ascii zeros)
+       pcrinfo=	  ascii hex of PCR_INFO or PCR_INFO_LONG (no default)
+       pcrlock=	  pcr number to be extended to "lock" blob
+       migratable= 0|1 indicating permission to reseal to new PCR values,
+                   default 1 (resealing allowed)
+
+"keyctl print" returns an ascii hex copy of the sealed key, which is in standard
+TPM_STORED_DATA format.  The key length for new keys are always in bytes.
+Trusted Keys can be 32 - 128 bytes (256 - 1024 bits), the upper limit is to fit
+within the 2048 bit SRK (RSA) keylength, with all necessary structure/padding.
+
+Encrypted keys do not depend on a TPM, and are faster, as they use AES for
+encryption/decryption.  New keys are created from kernel generated random
+numbers, and are encrypted/decrypted using a specified 'master' key.  The
+'master' key can either be a trusted-key or user-key type.  The main
+disadvantage of encrypted keys is that if they are not rooted in a trusted key,
+they are only as secure as the user key encrypting them.  The master user key
+should therefore be loaded in as secure a way as possible, preferably early in
+boot.
+
+The decrypted portion of encrypted keys can contain either a simple symmetric
+key or a more complex structure. The format of the more complex structure is
+application specific, which is identified by 'format'.
+
+Usage:
+    keyctl add encrypted name "new [format] key-type:master-key-name keylen"
+        ring
+    keyctl add encrypted name "load hex_blob" ring
+    keyctl update keyid "update key-type:master-key-name"
+
+format:= 'default | ecryptfs'
+key-type:= 'trusted' | 'user'
+
+
+Examples of trusted and encrypted key usage:
+
+Create and save a trusted key named "kmk" of length 32 bytes:
+
+    $ keyctl add trusted kmk "new 32" @u
+    440502848
+
+    $ keyctl show
+    Session Keyring
+           -3 --alswrv    500   500  keyring: _ses
+     97833714 --alswrv    500    -1   \_ keyring: _uid.500
+    440502848 --alswrv    500   500       \_ trusted: kmk
+
+    $ keyctl print 440502848
+    0101000000000000000001005d01b7e3f4a6be5709930f3b70a743cbb42e0cc95e18e915
+    3f60da455bbf1144ad12e4f92b452f966929f6105fd29ca28e4d4d5a031d068478bacb0b
+    27351119f822911b0a11ba3d3498ba6a32e50dac7f32894dd890eb9ad578e4e292c83722
+    a52e56a097e6a68b3f56f7a52ece0cdccba1eb62cad7d817f6dc58898b3ac15f36026fec
+    d568bd4a706cb60bb37be6d8f1240661199d640b66fb0fe3b079f97f450b9ef9c22c6d5d
+    dd379f0facd1cd020281dfa3c70ba21a3fa6fc2471dc6d13ecf8298b946f65345faa5ef0
+    f1f8fff03ad0acb083725535636addb08d73dedb9832da198081e5deae84bfaf0409c22b
+    e4a8aea2b607ec96931e6f4d4fe563ba
+
+    $ keyctl pipe 440502848 > kmk.blob
+
+Load a trusted key from the saved blob:
+
+    $ keyctl add trusted kmk "load `cat kmk.blob`" @u
+    268728824
+
+    $ keyctl print 268728824
+    0101000000000000000001005d01b7e3f4a6be5709930f3b70a743cbb42e0cc95e18e915
+    3f60da455bbf1144ad12e4f92b452f966929f6105fd29ca28e4d4d5a031d068478bacb0b
+    27351119f822911b0a11ba3d3498ba6a32e50dac7f32894dd890eb9ad578e4e292c83722
+    a52e56a097e6a68b3f56f7a52ece0cdccba1eb62cad7d817f6dc58898b3ac15f36026fec
+    d568bd4a706cb60bb37be6d8f1240661199d640b66fb0fe3b079f97f450b9ef9c22c6d5d
+    dd379f0facd1cd020281dfa3c70ba21a3fa6fc2471dc6d13ecf8298b946f65345faa5ef0
+    f1f8fff03ad0acb083725535636addb08d73dedb9832da198081e5deae84bfaf0409c22b
+    e4a8aea2b607ec96931e6f4d4fe563ba
+
+Reseal a trusted key under new pcr values:
+
+    $ keyctl update 268728824 "update pcrinfo=`cat pcr.blob`"
+    $ keyctl print 268728824
+    010100000000002c0002800093c35a09b70fff26e7a98ae786c641e678ec6ffb6b46d805
+    77c8a6377aed9d3219c6dfec4b23ffe3000001005d37d472ac8a44023fbb3d18583a4f73
+    d3a076c0858f6f1dcaa39ea0f119911ff03f5406df4f7f27f41da8d7194f45c9f4e00f2e
+    df449f266253aa3f52e55c53de147773e00f0f9aca86c64d94c95382265968c354c5eab4
+    9638c5ae99c89de1e0997242edfb0b501744e11ff9762dfd951cffd93227cc513384e7e6
+    e782c29435c7ec2edafaa2f4c1fe6e7a781b59549ff5296371b42133777dcc5b8b971610
+    94bc67ede19e43ddb9dc2baacad374a36feaf0314d700af0a65c164b7082401740e489c9
+    7ef6a24defe4846104209bf0c3eced7fa1a672ed5b125fc9d8cd88b476a658a4434644ef
+    df8ae9a178e9f83ba9f08d10fa47e4226b98b0702f06b3b8
+
+The initial consumer of trusted keys is EVM, which at boot time needs a high
+quality symmetric key for HMAC protection of file metadata.  The use of a
+trusted key provides strong guarantees that the EVM key has not been
+compromised by a user level problem, and when sealed to specific boot PCR
+values, protects against boot and offline attacks.  Create and save an
+encrypted key "evm" using the above trusted key "kmk":
+
+option 1: omitting 'format'
+    $ keyctl add encrypted evm "new trusted:kmk 32" @u
+    159771175
+
+option 2: explicitly defining 'format' as 'default'
+    $ keyctl add encrypted evm "new default trusted:kmk 32" @u
+    159771175
+
+    $ keyctl print 159771175
+    default trusted:kmk 32 2375725ad57798846a9bbd240de8906f006e66c03af53b1b3
+    82dbbc55be2a44616e4959430436dc4f2a7a9659aa60bb4652aeb2120f149ed197c564e0
+    24717c64 5972dcb82ab2dde83376d82b2e3c09ffc
+
+    $ keyctl pipe 159771175 > evm.blob
+
+Load an encrypted key "evm" from saved blob:
+
+    $ keyctl add encrypted evm "load `cat evm.blob`" @u
+    831684262
+
+    $ keyctl print 831684262
+    default trusted:kmk 32 2375725ad57798846a9bbd240de8906f006e66c03af53b1b3
+    82dbbc55be2a44616e4959430436dc4f2a7a9659aa60bb4652aeb2120f149ed197c564e0
+    24717c64 5972dcb82ab2dde83376d82b2e3c09ffc
+
+Other uses for trusted and encrypted keys, such as for disk and file encryption
+are anticipated.  In particular the new format 'ecryptfs' has been defined in
+in order to use encrypted keys to mount an eCryptfs filesystem.  More details
+about the usage can be found in the file
+'Documentation/security/keys-ecryptfs.txt'.
diff --git a/kernel/Documentation/security/keys.txt b/kernel/Documentation/security/keys.txt
new file mode 100644
index 000000000..c9e7f4f22
--- /dev/null
+++ b/kernel/Documentation/security/keys.txt
@@ -0,0 +1,1433 @@
+			 ============================
+			 KERNEL KEY RETENTION SERVICE
+			 ============================
+
+This service allows cryptographic keys, authentication tokens, cross-domain
+user mappings, and similar to be cached in the kernel for the use of
+filesystems and other kernel services.
+
+Keyrings are permitted; these are a special type of key that can hold links to
+other keys. Processes each have three standard keyring subscriptions that a
+kernel service can search for relevant keys.
+
+The key service can be configured on by enabling:
+
+	"Security options"/"Enable access key retention support" (CONFIG_KEYS)
+
+This document has the following sections:
+
+	- Key overview
+	- Key service overview
+	- Key access permissions
+	- SELinux support
+	- New procfs files
+	- Userspace system call interface
+	- Kernel services
+	- Notes on accessing payload contents
+	- Defining a key type
+	- Request-key callback service
+	- Garbage collection
+
+
+============
+KEY OVERVIEW
+============
+
+In this context, keys represent units of cryptographic data, authentication
+tokens, keyrings, etc.. These are represented in the kernel by struct key.
+
+Each key has a number of attributes:
+
+	- A serial number.
+	- A type.
+	- A description (for matching a key in a search).
+	- Access control information.
+	- An expiry time.
+	- A payload.
+	- State.
+
+
+ (*) Each key is issued a serial number of type key_serial_t that is unique for
+     the lifetime of that key. All serial numbers are positive non-zero 32-bit
+     integers.
+
+     Userspace programs can use a key's serial numbers as a way to gain access
+     to it, subject to permission checking.
+
+ (*) Each key is of a defined "type". Types must be registered inside the
+     kernel by a kernel service (such as a filesystem) before keys of that type
+     can be added or used. Userspace programs cannot define new types directly.
+
+     Key types are represented in the kernel by struct key_type. This defines a
+     number of operations that can be performed on a key of that type.
+
+     Should a type be removed from the system, all the keys of that type will
+     be invalidated.
+
+ (*) Each key has a description. This should be a printable string. The key
+     type provides an operation to perform a match between the description on a
+     key and a criterion string.
+
+ (*) Each key has an owner user ID, a group ID and a permissions mask. These
+     are used to control what a process may do to a key from userspace, and
+     whether a kernel service will be able to find the key.
+
+ (*) Each key can be set to expire at a specific time by the key type's
+     instantiation function. Keys can also be immortal.
+
+ (*) Each key can have a payload. This is a quantity of data that represent the
+     actual "key". In the case of a keyring, this is a list of keys to which
+     the keyring links; in the case of a user-defined key, it's an arbitrary
+     blob of data.
+
+     Having a payload is not required; and the payload can, in fact, just be a
+     value stored in the struct key itself.
+
+     When a key is instantiated, the key type's instantiation function is
+     called with a blob of data, and that then creates the key's payload in
+     some way.
+
+     Similarly, when userspace wants to read back the contents of the key, if
+     permitted, another key type operation will be called to convert the key's
+     attached payload back into a blob of data.
+
+ (*) Each key can be in one of a number of basic states:
+
+     (*) Uninstantiated. The key exists, but does not have any data attached.
+     	 Keys being requested from userspace will be in this state.
+
+     (*) Instantiated. This is the normal state. The key is fully formed, and
+	 has data attached.
+
+     (*) Negative. This is a relatively short-lived state. The key acts as a
+	 note saying that a previous call out to userspace failed, and acts as
+	 a throttle on key lookups. A negative key can be updated to a normal
+	 state.
+
+     (*) Expired. Keys can have lifetimes set. If their lifetime is exceeded,
+	 they traverse to this state. An expired key can be updated back to a
+	 normal state.
+
+     (*) Revoked. A key is put in this state by userspace action. It can't be
+	 found or operated upon (apart from by unlinking it).
+
+     (*) Dead. The key's type was unregistered, and so the key is now useless.
+
+Keys in the last three states are subject to garbage collection.  See the
+section on "Garbage collection".
+
+
+====================
+KEY SERVICE OVERVIEW
+====================
+
+The key service provides a number of features besides keys:
+
+ (*) The key service defines three special key types:
+
+     (+) "keyring"
+
+	 Keyrings are special keys that contain a list of other keys. Keyring
+	 lists can be modified using various system calls. Keyrings should not
+	 be given a payload when created.
+
+     (+) "user"
+
+	 A key of this type has a description and a payload that are arbitrary
+	 blobs of data. These can be created, updated and read by userspace,
+	 and aren't intended for use by kernel services.
+
+     (+) "logon"
+
+	 Like a "user" key, a "logon" key has a payload that is an arbitrary
+	 blob of data. It is intended as a place to store secrets which are
+	 accessible to the kernel but not to userspace programs.
+
+	 The description can be arbitrary, but must be prefixed with a non-zero
+	 length string that describes the key "subclass". The subclass is
+	 separated from the rest of the description by a ':'. "logon" keys can
+	 be created and updated from userspace, but the payload is only
+	 readable from kernel space.
+
+ (*) Each process subscribes to three keyrings: a thread-specific keyring, a
+     process-specific keyring, and a session-specific keyring.
+
+     The thread-specific keyring is discarded from the child when any sort of
+     clone, fork, vfork or execve occurs. A new keyring is created only when
+     required.
+
+     The process-specific keyring is replaced with an empty one in the child on
+     clone, fork, vfork unless CLONE_THREAD is supplied, in which case it is
+     shared. execve also discards the process's process keyring and creates a
+     new one.
+
+     The session-specific keyring is persistent across clone, fork, vfork and
+     execve, even when the latter executes a set-UID or set-GID binary. A
+     process can, however, replace its current session keyring with a new one
+     by using PR_JOIN_SESSION_KEYRING. It is permitted to request an anonymous
+     new one, or to attempt to create or join one of a specific name.
+
+     The ownership of the thread keyring changes when the real UID and GID of
+     the thread changes.
+
+ (*) Each user ID resident in the system holds two special keyrings: a user
+     specific keyring and a default user session keyring. The default session
+     keyring is initialised with a link to the user-specific keyring.
+
+     When a process changes its real UID, if it used to have no session key, it
+     will be subscribed to the default session key for the new UID.
+
+     If a process attempts to access its session key when it doesn't have one,
+     it will be subscribed to the default for its current UID.
+
+ (*) Each user has two quotas against which the keys they own are tracked. One
+     limits the total number of keys and keyrings, the other limits the total
+     amount of description and payload space that can be consumed.
+
+     The user can view information on this and other statistics through procfs
+     files.  The root user may also alter the quota limits through sysctl files
+     (see the section "New procfs files").
+
+     Process-specific and thread-specific keyrings are not counted towards a
+     user's quota.
+
+     If a system call that modifies a key or keyring in some way would put the
+     user over quota, the operation is refused and error EDQUOT is returned.
+
+ (*) There's a system call interface by which userspace programs can create and
+     manipulate keys and keyrings.
+
+ (*) There's a kernel interface by which services can register types and search
+     for keys.
+
+ (*) There's a way for the a search done from the kernel to call back to
+     userspace to request a key that can't be found in a process's keyrings.
+
+ (*) An optional filesystem is available through which the key database can be
+     viewed and manipulated.
+
+
+======================
+KEY ACCESS PERMISSIONS
+======================
+
+Keys have an owner user ID, a group access ID, and a permissions mask. The mask
+has up to eight bits each for possessor, user, group and other access. Only
+six of each set of eight bits are defined. These permissions granted are:
+
+ (*) View
+
+     This permits a key or keyring's attributes to be viewed - including key
+     type and description.
+
+ (*) Read
+
+     This permits a key's payload to be viewed or a keyring's list of linked
+     keys.
+
+ (*) Write
+
+     This permits a key's payload to be instantiated or updated, or it allows a
+     link to be added to or removed from a keyring.
+
+ (*) Search
+
+     This permits keyrings to be searched and keys to be found. Searches can
+     only recurse into nested keyrings that have search permission set.
+
+ (*) Link
+
+     This permits a key or keyring to be linked to. To create a link from a
+     keyring to a key, a process must have Write permission on the keyring and
+     Link permission on the key.
+
+ (*) Set Attribute
+
+     This permits a key's UID, GID and permissions mask to be changed.
+
+For changing the ownership, group ID or permissions mask, being the owner of
+the key or having the sysadmin capability is sufficient.
+
+
+===============
+SELINUX SUPPORT
+===============
+
+The security class "key" has been added to SELinux so that mandatory access
+controls can be applied to keys created within various contexts.  This support
+is preliminary, and is likely to change quite significantly in the near future.
+Currently, all of the basic permissions explained above are provided in SELinux
+as well; SELinux is simply invoked after all basic permission checks have been
+performed.
+
+The value of the file /proc/self/attr/keycreate influences the labeling of
+newly-created keys.  If the contents of that file correspond to an SELinux
+security context, then the key will be assigned that context.  Otherwise, the
+key will be assigned the current context of the task that invoked the key
+creation request.  Tasks must be granted explicit permission to assign a
+particular context to newly-created keys, using the "create" permission in the
+key security class.
+
+The default keyrings associated with users will be labeled with the default
+context of the user if and only if the login programs have been instrumented to
+properly initialize keycreate during the login process.  Otherwise, they will
+be labeled with the context of the login program itself.
+
+Note, however, that the default keyrings associated with the root user are
+labeled with the default kernel context, since they are created early in the
+boot process, before root has a chance to log in.
+
+The keyrings associated with new threads are each labeled with the context of
+their associated thread, and both session and process keyrings are handled
+similarly.
+
+
+================
+NEW PROCFS FILES
+================
+
+Two files have been added to procfs by which an administrator can find out
+about the status of the key service:
+
+ (*) /proc/keys
+
+     This lists the keys that are currently viewable by the task reading the
+     file, giving information about their type, description and permissions.
+     It is not possible to view the payload of the key this way, though some
+     information about it may be given.
+
+     The only keys included in the list are those that grant View permission to
+     the reading process whether or not it possesses them.  Note that LSM
+     security checks are still performed, and may further filter out keys that
+     the current process is not authorised to view.
+
+     The contents of the file look like this:
+
+	SERIAL   FLAGS  USAGE EXPY PERM     UID   GID   TYPE      DESCRIPTION: SUMMARY
+	00000001 I-----    39 perm 1f3f0000     0     0 keyring   _uid_ses.0: 1/4
+	00000002 I-----     2 perm 1f3f0000     0     0 keyring   _uid.0: empty
+	00000007 I-----     1 perm 1f3f0000     0     0 keyring   _pid.1: empty
+	0000018d I-----     1 perm 1f3f0000     0     0 keyring   _pid.412: empty
+	000004d2 I--Q--     1 perm 1f3f0000    32    -1 keyring   _uid.32: 1/4
+	000004d3 I--Q--     3 perm 1f3f0000    32    -1 keyring   _uid_ses.32: empty
+	00000892 I--QU-     1 perm 1f000000     0     0 user      metal:copper: 0
+	00000893 I--Q-N     1  35s 1f3f0000     0     0 user      metal:silver: 0
+	00000894 I--Q--     1  10h 003f0000     0     0 user      metal:gold: 0
+
+     The flags are:
+
+	I	Instantiated
+	R	Revoked
+	D	Dead
+	Q	Contributes to user's quota
+	U	Under construction by callback to userspace
+	N	Negative key
+
+
+ (*) /proc/key-users
+
+     This file lists the tracking data for each user that has at least one key
+     on the system.  Such data includes quota information and statistics:
+
+	[root@andromeda root]# cat /proc/key-users
+	0:     46 45/45 1/100 13/10000
+	29:     2 2/2 2/100 40/10000
+	32:     2 2/2 2/100 40/10000
+	38:     2 2/2 2/100 40/10000
+
+     The format of each line is
+	<UID>:			User ID to which this applies
+	<usage>			Structure refcount
+	<inst>/<keys>		Total number of keys and number instantiated
+	<keys>/<max>		Key count quota
+	<bytes>/<max>		Key size quota
+
+
+Four new sysctl files have been added also for the purpose of controlling the
+quota limits on keys:
+
+ (*) /proc/sys/kernel/keys/root_maxkeys
+     /proc/sys/kernel/keys/root_maxbytes
+
+     These files hold the maximum number of keys that root may have and the
+     maximum total number of bytes of data that root may have stored in those
+     keys.
+
+ (*) /proc/sys/kernel/keys/maxkeys
+     /proc/sys/kernel/keys/maxbytes
+
+     These files hold the maximum number of keys that each non-root user may
+     have and the maximum total number of bytes of data that each of those
+     users may have stored in their keys.
+
+Root may alter these by writing each new limit as a decimal number string to
+the appropriate file.
+
+
+===============================
+USERSPACE SYSTEM CALL INTERFACE
+===============================
+
+Userspace can manipulate keys directly through three new syscalls: add_key,
+request_key and keyctl. The latter provides a number of functions for
+manipulating keys.
+
+When referring to a key directly, userspace programs should use the key's
+serial number (a positive 32-bit integer). However, there are some special
+values available for referring to special keys and keyrings that relate to the
+process making the call:
+
+	CONSTANT			VALUE	KEY REFERENCED
+	==============================	======	===========================
+	KEY_SPEC_THREAD_KEYRING		-1	thread-specific keyring
+	KEY_SPEC_PROCESS_KEYRING	-2	process-specific keyring
+	KEY_SPEC_SESSION_KEYRING	-3	session-specific keyring
+	KEY_SPEC_USER_KEYRING		-4	UID-specific keyring
+	KEY_SPEC_USER_SESSION_KEYRING	-5	UID-session keyring
+	KEY_SPEC_GROUP_KEYRING		-6	GID-specific keyring
+	KEY_SPEC_REQKEY_AUTH_KEY	-7	assumed request_key()
+						  authorisation key
+
+
+The main syscalls are:
+
+ (*) Create a new key of given type, description and payload and add it to the
+     nominated keyring:
+
+	key_serial_t add_key(const char *type, const char *desc,
+			     const void *payload, size_t plen,
+			     key_serial_t keyring);
+
+     If a key of the same type and description as that proposed already exists
+     in the keyring, this will try to update it with the given payload, or it
+     will return error EEXIST if that function is not supported by the key
+     type. The process must also have permission to write to the key to be able
+     to update it. The new key will have all user permissions granted and no
+     group or third party permissions.
+
+     Otherwise, this will attempt to create a new key of the specified type and
+     description, and to instantiate it with the supplied payload and attach it
+     to the keyring. In this case, an error will be generated if the process
+     does not have permission to write to the keyring.
+
+     If the key type supports it, if the description is NULL or an empty
+     string, the key type will try and generate a description from the content
+     of the payload.
+
+     The payload is optional, and the pointer can be NULL if not required by
+     the type. The payload is plen in size, and plen can be zero for an empty
+     payload.
+
+     A new keyring can be generated by setting type "keyring", the keyring name
+     as the description (or NULL) and setting the payload to NULL.
+
+     User defined keys can be created by specifying type "user". It is
+     recommended that a user defined key's description by prefixed with a type
+     ID and a colon, such as "krb5tgt:" for a Kerberos 5 ticket granting
+     ticket.
+
+     Any other type must have been registered with the kernel in advance by a
+     kernel service such as a filesystem.
+
+     The ID of the new or updated key is returned if successful.
+
+
+ (*) Search the process's keyrings for a key, potentially calling out to
+     userspace to create it.
+
+	key_serial_t request_key(const char *type, const char *description,
+				 const char *callout_info,
+				 key_serial_t dest_keyring);
+
+     This function searches all the process's keyrings in the order thread,
+     process, session for a matching key. This works very much like
+     KEYCTL_SEARCH, including the optional attachment of the discovered key to
+     a keyring.
+
+     If a key cannot be found, and if callout_info is not NULL, then
+     /sbin/request-key will be invoked in an attempt to obtain a key. The
+     callout_info string will be passed as an argument to the program.
+
+     See also Documentation/security/keys-request-key.txt.
+
+
+The keyctl syscall functions are:
+
+ (*) Map a special key ID to a real key ID for this process:
+
+	key_serial_t keyctl(KEYCTL_GET_KEYRING_ID, key_serial_t id,
+			    int create);
+
+     The special key specified by "id" is looked up (with the key being created
+     if necessary) and the ID of the key or keyring thus found is returned if
+     it exists.
+
+     If the key does not yet exist, the key will be created if "create" is
+     non-zero; and the error ENOKEY will be returned if "create" is zero.
+
+
+ (*) Replace the session keyring this process subscribes to with a new one:
+
+	key_serial_t keyctl(KEYCTL_JOIN_SESSION_KEYRING, const char *name);
+
+     If name is NULL, an anonymous keyring is created attached to the process
+     as its session keyring, displacing the old session keyring.
+
+     If name is not NULL, if a keyring of that name exists, the process
+     attempts to attach it as the session keyring, returning an error if that
+     is not permitted; otherwise a new keyring of that name is created and
+     attached as the session keyring.
+
+     To attach to a named keyring, the keyring must have search permission for
+     the process's ownership.
+
+     The ID of the new session keyring is returned if successful.
+
+
+ (*) Update the specified key:
+
+	long keyctl(KEYCTL_UPDATE, key_serial_t key, const void *payload,
+		    size_t plen);
+
+     This will try to update the specified key with the given payload, or it
+     will return error EOPNOTSUPP if that function is not supported by the key
+     type. The process must also have permission to write to the key to be able
+     to update it.
+
+     The payload is of length plen, and may be absent or empty as for
+     add_key().
+
+
+ (*) Revoke a key:
+
+	long keyctl(KEYCTL_REVOKE, key_serial_t key);
+
+     This makes a key unavailable for further operations. Further attempts to
+     use the key will be met with error EKEYREVOKED, and the key will no longer
+     be findable.
+
+
+ (*) Change the ownership of a key:
+
+	long keyctl(KEYCTL_CHOWN, key_serial_t key, uid_t uid, gid_t gid);
+
+     This function permits a key's owner and group ID to be changed. Either one
+     of uid or gid can be set to -1 to suppress that change.
+
+     Only the superuser can change a key's owner to something other than the
+     key's current owner. Similarly, only the superuser can change a key's
+     group ID to something other than the calling process's group ID or one of
+     its group list members.
+
+
+ (*) Change the permissions mask on a key:
+
+	long keyctl(KEYCTL_SETPERM, key_serial_t key, key_perm_t perm);
+
+     This function permits the owner of a key or the superuser to change the
+     permissions mask on a key.
+
+     Only bits the available bits are permitted; if any other bits are set,
+     error EINVAL will be returned.
+
+
+ (*) Describe a key:
+
+	long keyctl(KEYCTL_DESCRIBE, key_serial_t key, char *buffer,
+		    size_t buflen);
+
+     This function returns a summary of the key's attributes (but not its
+     payload data) as a string in the buffer provided.
+
+     Unless there's an error, it always returns the amount of data it could
+     produce, even if that's too big for the buffer, but it won't copy more
+     than requested to userspace. If the buffer pointer is NULL then no copy
+     will take place.
+
+     A process must have view permission on the key for this function to be
+     successful.
+
+     If successful, a string is placed in the buffer in the following format:
+
+	<type>;<uid>;<gid>;<perm>;<description>
+
+     Where type and description are strings, uid and gid are decimal, and perm
+     is hexadecimal. A NUL character is included at the end of the string if
+     the buffer is sufficiently big.
+
+     This can be parsed with
+
+	sscanf(buffer, "%[^;];%d;%d;%o;%s", type, &uid, &gid, &mode, desc);
+
+
+ (*) Clear out a keyring:
+
+	long keyctl(KEYCTL_CLEAR, key_serial_t keyring);
+
+     This function clears the list of keys attached to a keyring. The calling
+     process must have write permission on the keyring, and it must be a
+     keyring (or else error ENOTDIR will result).
+
+     This function can also be used to clear special kernel keyrings if they
+     are appropriately marked if the user has CAP_SYS_ADMIN capability.  The
+     DNS resolver cache keyring is an example of this.
+
+
+ (*) Link a key into a keyring:
+
+	long keyctl(KEYCTL_LINK, key_serial_t keyring, key_serial_t key);
+
+     This function creates a link from the keyring to the key. The process must
+     have write permission on the keyring and must have link permission on the
+     key.
+
+     Should the keyring not be a keyring, error ENOTDIR will result; and if the
+     keyring is full, error ENFILE will result.
+
+     The link procedure checks the nesting of the keyrings, returning ELOOP if
+     it appears too deep or EDEADLK if the link would introduce a cycle.
+
+     Any links within the keyring to keys that match the new key in terms of
+     type and description will be discarded from the keyring as the new one is
+     added.
+
+
+ (*) Unlink a key or keyring from another keyring:
+
+	long keyctl(KEYCTL_UNLINK, key_serial_t keyring, key_serial_t key);
+
+     This function looks through the keyring for the first link to the
+     specified key, and removes it if found. Subsequent links to that key are
+     ignored. The process must have write permission on the keyring.
+
+     If the keyring is not a keyring, error ENOTDIR will result; and if the key
+     is not present, error ENOENT will be the result.
+
+
+ (*) Search a keyring tree for a key:
+
+	key_serial_t keyctl(KEYCTL_SEARCH, key_serial_t keyring,
+			    const char *type, const char *description,
+			    key_serial_t dest_keyring);
+
+     This searches the keyring tree headed by the specified keyring until a key
+     is found that matches the type and description criteria. Each keyring is
+     checked for keys before recursion into its children occurs.
+
+     The process must have search permission on the top level keyring, or else
+     error EACCES will result. Only keyrings that the process has search
+     permission on will be recursed into, and only keys and keyrings for which
+     a process has search permission can be matched. If the specified keyring
+     is not a keyring, ENOTDIR will result.
+
+     If the search succeeds, the function will attempt to link the found key
+     into the destination keyring if one is supplied (non-zero ID). All the
+     constraints applicable to KEYCTL_LINK apply in this case too.
+
+     Error ENOKEY, EKEYREVOKED or EKEYEXPIRED will be returned if the search
+     fails. On success, the resulting key ID will be returned.
+
+
+ (*) Read the payload data from a key:
+
+	long keyctl(KEYCTL_READ, key_serial_t keyring, char *buffer,
+		    size_t buflen);
+
+     This function attempts to read the payload data from the specified key
+     into the buffer. The process must have read permission on the key to
+     succeed.
+
+     The returned data will be processed for presentation by the key type. For
+     instance, a keyring will return an array of key_serial_t entries
+     representing the IDs of all the keys to which it is subscribed. The user
+     defined key type will return its data as is. If a key type does not
+     implement this function, error EOPNOTSUPP will result.
+
+     As much of the data as can be fitted into the buffer will be copied to
+     userspace if the buffer pointer is not NULL.
+
+     On a successful return, the function will always return the amount of data
+     available rather than the amount copied.
+
+
+ (*) Instantiate a partially constructed key.
+
+	long keyctl(KEYCTL_INSTANTIATE, key_serial_t key,
+		    const void *payload, size_t plen,
+		    key_serial_t keyring);
+	long keyctl(KEYCTL_INSTANTIATE_IOV, key_serial_t key,
+		    const struct iovec *payload_iov, unsigned ioc,
+		    key_serial_t keyring);
+
+     If the kernel calls back to userspace to complete the instantiation of a
+     key, userspace should use this call to supply data for the key before the
+     invoked process returns, or else the key will be marked negative
+     automatically.
+
+     The process must have write access on the key to be able to instantiate
+     it, and the key must be uninstantiated.
+
+     If a keyring is specified (non-zero), the key will also be linked into
+     that keyring, however all the constraints applying in KEYCTL_LINK apply in
+     this case too.
+
+     The payload and plen arguments describe the payload data as for add_key().
+
+     The payload_iov and ioc arguments describe the payload data in an iovec
+     array instead of a single buffer.
+
+
+ (*) Negatively instantiate a partially constructed key.
+
+	long keyctl(KEYCTL_NEGATE, key_serial_t key,
+		    unsigned timeout, key_serial_t keyring);
+	long keyctl(KEYCTL_REJECT, key_serial_t key,
+		    unsigned timeout, unsigned error, key_serial_t keyring);
+
+     If the kernel calls back to userspace to complete the instantiation of a
+     key, userspace should use this call mark the key as negative before the
+     invoked process returns if it is unable to fulfill the request.
+
+     The process must have write access on the key to be able to instantiate
+     it, and the key must be uninstantiated.
+
+     If a keyring is specified (non-zero), the key will also be linked into
+     that keyring, however all the constraints applying in KEYCTL_LINK apply in
+     this case too.
+
+     If the key is rejected, future searches for it will return the specified
+     error code until the rejected key expires.  Negating the key is the same
+     as rejecting the key with ENOKEY as the error code.
+
+
+ (*) Set the default request-key destination keyring.
+
+	long keyctl(KEYCTL_SET_REQKEY_KEYRING, int reqkey_defl);
+
+     This sets the default keyring to which implicitly requested keys will be
+     attached for this thread. reqkey_defl should be one of these constants:
+
+	CONSTANT				VALUE	NEW DEFAULT KEYRING
+	======================================	======	=======================
+	KEY_REQKEY_DEFL_NO_CHANGE		-1	No change
+	KEY_REQKEY_DEFL_DEFAULT			0	Default[1]
+	KEY_REQKEY_DEFL_THREAD_KEYRING		1	Thread keyring
+	KEY_REQKEY_DEFL_PROCESS_KEYRING		2	Process keyring
+	KEY_REQKEY_DEFL_SESSION_KEYRING		3	Session keyring
+	KEY_REQKEY_DEFL_USER_KEYRING		4	User keyring
+	KEY_REQKEY_DEFL_USER_SESSION_KEYRING	5	User session keyring
+	KEY_REQKEY_DEFL_GROUP_KEYRING		6	Group keyring
+
+     The old default will be returned if successful and error EINVAL will be
+     returned if reqkey_defl is not one of the above values.
+
+     The default keyring can be overridden by the keyring indicated to the
+     request_key() system call.
+
+     Note that this setting is inherited across fork/exec.
+
+     [1] The default is: the thread keyring if there is one, otherwise
+     the process keyring if there is one, otherwise the session keyring if
+     there is one, otherwise the user default session keyring.
+
+
+ (*) Set the timeout on a key.
+
+	long keyctl(KEYCTL_SET_TIMEOUT, key_serial_t key, unsigned timeout);
+
+     This sets or clears the timeout on a key. The timeout can be 0 to clear
+     the timeout or a number of seconds to set the expiry time that far into
+     the future.
+
+     The process must have attribute modification access on a key to set its
+     timeout. Timeouts may not be set with this function on negative, revoked
+     or expired keys.
+
+
+ (*) Assume the authority granted to instantiate a key
+
+	long keyctl(KEYCTL_ASSUME_AUTHORITY, key_serial_t key);
+
+     This assumes or divests the authority required to instantiate the
+     specified key. Authority can only be assumed if the thread has the
+     authorisation key associated with the specified key in its keyrings
+     somewhere.
+
+     Once authority is assumed, searches for keys will also search the
+     requester's keyrings using the requester's security label, UID, GID and
+     groups.
+
+     If the requested authority is unavailable, error EPERM will be returned,
+     likewise if the authority has been revoked because the target key is
+     already instantiated.
+
+     If the specified key is 0, then any assumed authority will be divested.
+
+     The assumed authoritative key is inherited across fork and exec.
+
+
+ (*) Get the LSM security context attached to a key.
+
+	long keyctl(KEYCTL_GET_SECURITY, key_serial_t key, char *buffer,
+		    size_t buflen)
+
+     This function returns a string that represents the LSM security context
+     attached to a key in the buffer provided.
+
+     Unless there's an error, it always returns the amount of data it could
+     produce, even if that's too big for the buffer, but it won't copy more
+     than requested to userspace. If the buffer pointer is NULL then no copy
+     will take place.
+
+     A NUL character is included at the end of the string if the buffer is
+     sufficiently big.  This is included in the returned count.  If no LSM is
+     in force then an empty string will be returned.
+
+     A process must have view permission on the key for this function to be
+     successful.
+
+
+ (*) Install the calling process's session keyring on its parent.
+
+	long keyctl(KEYCTL_SESSION_TO_PARENT);
+
+     This functions attempts to install the calling process's session keyring
+     on to the calling process's parent, replacing the parent's current session
+     keyring.
+
+     The calling process must have the same ownership as its parent, the
+     keyring must have the same ownership as the calling process, the calling
+     process must have LINK permission on the keyring and the active LSM module
+     mustn't deny permission, otherwise error EPERM will be returned.
+
+     Error ENOMEM will be returned if there was insufficient memory to complete
+     the operation, otherwise 0 will be returned to indicate success.
+
+     The keyring will be replaced next time the parent process leaves the
+     kernel and resumes executing userspace.
+
+
+ (*) Invalidate a key.
+
+	long keyctl(KEYCTL_INVALIDATE, key_serial_t key);
+
+     This function marks a key as being invalidated and then wakes up the
+     garbage collector.  The garbage collector immediately removes invalidated
+     keys from all keyrings and deletes the key when its reference count
+     reaches zero.
+
+     Keys that are marked invalidated become invisible to normal key operations
+     immediately, though they are still visible in /proc/keys until deleted
+     (they're marked with an 'i' flag).
+
+     A process must have search permission on the key for this function to be
+     successful.
+
+
+===============
+KERNEL SERVICES
+===============
+
+The kernel services for key management are fairly simple to deal with. They can
+be broken down into two areas: keys and key types.
+
+Dealing with keys is fairly straightforward. Firstly, the kernel service
+registers its type, then it searches for a key of that type. It should retain
+the key as long as it has need of it, and then it should release it. For a
+filesystem or device file, a search would probably be performed during the open
+call, and the key released upon close. How to deal with conflicting keys due to
+two different users opening the same file is left to the filesystem author to
+solve.
+
+To access the key manager, the following header must be #included:
+
+	<linux/key.h>
+
+Specific key types should have a header file under include/keys/ that should be
+used to access that type.  For keys of type "user", for example, that would be:
+
+	<keys/user-type.h>
+
+Note that there are two different types of pointers to keys that may be
+encountered:
+
+ (*) struct key *
+
+     This simply points to the key structure itself. Key structures will be at
+     least four-byte aligned.
+
+ (*) key_ref_t
+
+     This is equivalent to a struct key *, but the least significant bit is set
+     if the caller "possesses" the key. By "possession" it is meant that the
+     calling processes has a searchable link to the key from one of its
+     keyrings. There are three functions for dealing with these:
+
+	key_ref_t make_key_ref(const struct key *key, bool possession);
+
+	struct key *key_ref_to_ptr(const key_ref_t key_ref);
+
+	bool is_key_possessed(const key_ref_t key_ref);
+
+     The first function constructs a key reference from a key pointer and
+     possession information (which must be true or false).
+
+     The second function retrieves the key pointer from a reference and the
+     third retrieves the possession flag.
+
+When accessing a key's payload contents, certain precautions must be taken to
+prevent access vs modification races. See the section "Notes on accessing
+payload contents" for more information.
+
+(*) To search for a key, call:
+
+	struct key *request_key(const struct key_type *type,
+				const char *description,
+				const char *callout_info);
+
+    This is used to request a key or keyring with a description that matches
+    the description specified according to the key type's match_preparse()
+    method. This permits approximate matching to occur. If callout_string is
+    not NULL, then /sbin/request-key will be invoked in an attempt to obtain
+    the key from userspace. In that case, callout_string will be passed as an
+    argument to the program.
+
+    Should the function fail error ENOKEY, EKEYEXPIRED or EKEYREVOKED will be
+    returned.
+
+    If successful, the key will have been attached to the default keyring for
+    implicitly obtained request-key keys, as set by KEYCTL_SET_REQKEY_KEYRING.
+
+    See also Documentation/security/keys-request-key.txt.
+
+
+(*) To search for a key, passing auxiliary data to the upcaller, call:
+
+	struct key *request_key_with_auxdata(const struct key_type *type,
+					     const char *description,
+					     const void *callout_info,
+					     size_t callout_len,
+					     void *aux);
+
+    This is identical to request_key(), except that the auxiliary data is
+    passed to the key_type->request_key() op if it exists, and the callout_info
+    is a blob of length callout_len, if given (the length may be 0).
+
+
+(*) A key can be requested asynchronously by calling one of:
+
+	struct key *request_key_async(const struct key_type *type,
+				      const char *description,
+				      const void *callout_info,
+				      size_t callout_len);
+
+    or:
+
+	struct key *request_key_async_with_auxdata(const struct key_type *type,
+						   const char *description,
+						   const char *callout_info,
+					     	   size_t callout_len,
+					     	   void *aux);
+
+    which are asynchronous equivalents of request_key() and
+    request_key_with_auxdata() respectively.
+
+    These two functions return with the key potentially still under
+    construction.  To wait for construction completion, the following should be
+    called:
+
+	int wait_for_key_construction(struct key *key, bool intr);
+
+    The function will wait for the key to finish being constructed and then
+    invokes key_validate() to return an appropriate value to indicate the state
+    of the key (0 indicates the key is usable).
+
+    If intr is true, then the wait can be interrupted by a signal, in which
+    case error ERESTARTSYS will be returned.
+
+
+(*) When it is no longer required, the key should be released using:
+
+	void key_put(struct key *key);
+
+    Or:
+
+	void key_ref_put(key_ref_t key_ref);
+
+    These can be called from interrupt context. If CONFIG_KEYS is not set then
+    the argument will not be parsed.
+
+
+(*) Extra references can be made to a key by calling one of the following
+    functions:
+
+	struct key *__key_get(struct key *key);
+	struct key *key_get(struct key *key);
+
+    Keys so references will need to be disposed of by calling key_put() when
+    they've been finished with.  The key pointer passed in will be returned.
+
+    In the case of key_get(), if the pointer is NULL or CONFIG_KEYS is not set
+    then the key will not be dereferenced and no increment will take place.
+
+
+(*) A key's serial number can be obtained by calling:
+
+	key_serial_t key_serial(struct key *key);
+
+    If key is NULL or if CONFIG_KEYS is not set then 0 will be returned (in the
+    latter case without parsing the argument).
+
+
+(*) If a keyring was found in the search, this can be further searched by:
+
+	key_ref_t keyring_search(key_ref_t keyring_ref,
+				 const struct key_type *type,
+				 const char *description)
+
+    This searches the keyring tree specified for a matching key. Error ENOKEY
+    is returned upon failure (use IS_ERR/PTR_ERR to determine). If successful,
+    the returned key will need to be released.
+
+    The possession attribute from the keyring reference is used to control
+    access through the permissions mask and is propagated to the returned key
+    reference pointer if successful.
+
+
+(*) A keyring can be created by:
+
+	struct key *keyring_alloc(const char *description, uid_t uid, gid_t gid,
+				  const struct cred *cred,
+				  key_perm_t perm,
+				  unsigned long flags,
+				  struct key *dest);
+
+    This creates a keyring with the given attributes and returns it.  If dest
+    is not NULL, the new keyring will be linked into the keyring to which it
+    points.  No permission checks are made upon the destination keyring.
+
+    Error EDQUOT can be returned if the keyring would overload the quota (pass
+    KEY_ALLOC_NOT_IN_QUOTA in flags if the keyring shouldn't be accounted
+    towards the user's quota).  Error ENOMEM can also be returned.
+
+
+(*) To check the validity of a key, this function can be called:
+
+	int validate_key(struct key *key);
+
+    This checks that the key in question hasn't expired or and hasn't been
+    revoked. Should the key be invalid, error EKEYEXPIRED or EKEYREVOKED will
+    be returned. If the key is NULL or if CONFIG_KEYS is not set then 0 will be
+    returned (in the latter case without parsing the argument).
+
+
+(*) To register a key type, the following function should be called:
+
+	int register_key_type(struct key_type *type);
+
+    This will return error EEXIST if a type of the same name is already
+    present.
+
+
+(*) To unregister a key type, call:
+
+	void unregister_key_type(struct key_type *type);
+
+
+Under some circumstances, it may be desirable to deal with a bundle of keys.
+The facility provides access to the keyring type for managing such a bundle:
+
+	struct key_type key_type_keyring;
+
+This can be used with a function such as request_key() to find a specific
+keyring in a process's keyrings.  A keyring thus found can then be searched
+with keyring_search().  Note that it is not possible to use request_key() to
+search a specific keyring, so using keyrings in this way is of limited utility.
+
+
+===================================
+NOTES ON ACCESSING PAYLOAD CONTENTS
+===================================
+
+The simplest payload is just a number in key->payload.value. In this case,
+there's no need to indulge in RCU or locking when accessing the payload.
+
+More complex payload contents must be allocated and a pointer to them set in
+key->payload.data. One of the following ways must be selected to access the
+data:
+
+ (1) Unmodifiable key type.
+
+     If the key type does not have a modify method, then the key's payload can
+     be accessed without any form of locking, provided that it's known to be
+     instantiated (uninstantiated keys cannot be "found").
+
+ (2) The key's semaphore.
+
+     The semaphore could be used to govern access to the payload and to control
+     the payload pointer. It must be write-locked for modifications and would
+     have to be read-locked for general access. The disadvantage of doing this
+     is that the accessor may be required to sleep.
+
+ (3) RCU.
+
+     RCU must be used when the semaphore isn't already held; if the semaphore
+     is held then the contents can't change under you unexpectedly as the
+     semaphore must still be used to serialise modifications to the key. The
+     key management code takes care of this for the key type.
+
+     However, this means using:
+
+	rcu_read_lock() ... rcu_dereference() ... rcu_read_unlock()
+
+     to read the pointer, and:
+
+	rcu_dereference() ... rcu_assign_pointer() ... call_rcu()
+
+     to set the pointer and dispose of the old contents after a grace period.
+     Note that only the key type should ever modify a key's payload.
+
+     Furthermore, an RCU controlled payload must hold a struct rcu_head for the
+     use of call_rcu() and, if the payload is of variable size, the length of
+     the payload. key->datalen cannot be relied upon to be consistent with the
+     payload just dereferenced if the key's semaphore is not held.
+
+
+===================
+DEFINING A KEY TYPE
+===================
+
+A kernel service may want to define its own key type. For instance, an AFS
+filesystem might want to define a Kerberos 5 ticket key type. To do this, it
+author fills in a key_type struct and registers it with the system.
+
+Source files that implement key types should include the following header file:
+
+	<linux/key-type.h>
+
+The structure has a number of fields, some of which are mandatory:
+
+ (*) const char *name
+
+     The name of the key type. This is used to translate a key type name
+     supplied by userspace into a pointer to the structure.
+
+
+ (*) size_t def_datalen
+
+     This is optional - it supplies the default payload data length as
+     contributed to the quota. If the key type's payload is always or almost
+     always the same size, then this is a more efficient way to do things.
+
+     The data length (and quota) on a particular key can always be changed
+     during instantiation or update by calling:
+
+	int key_payload_reserve(struct key *key, size_t datalen);
+
+     With the revised data length. Error EDQUOT will be returned if this is not
+     viable.
+
+
+ (*) int (*vet_description)(const char *description);
+
+     This optional method is called to vet a key description.  If the key type
+     doesn't approve of the key description, it may return an error, otherwise
+     it should return 0.
+
+
+ (*) int (*preparse)(struct key_preparsed_payload *prep);
+
+     This optional method permits the key type to attempt to parse payload
+     before a key is created (add key) or the key semaphore is taken (update or
+     instantiate key).  The structure pointed to by prep looks like:
+
+	struct key_preparsed_payload {
+		char		*description;
+		void		*type_data[2];
+		void		*payload;
+		const void	*data;
+		size_t		datalen;
+		size_t		quotalen;
+		time_t		expiry;
+	};
+
+     Before calling the method, the caller will fill in data and datalen with
+     the payload blob parameters; quotalen will be filled in with the default
+     quota size from the key type; expiry will be set to TIME_T_MAX and the
+     rest will be cleared.
+
+     If a description can be proposed from the payload contents, that should be
+     attached as a string to the description field.  This will be used for the
+     key description if the caller of add_key() passes NULL or "".
+
+     The method can attach anything it likes to type_data[] and payload.  These
+     are merely passed along to the instantiate() or update() operations.  If
+     set, the expiry time will be applied to the key if it is instantiated from
+     this data.
+
+     The method should return 0 if successful or a negative error code
+     otherwise.
+
+
+ (*) void (*free_preparse)(struct key_preparsed_payload *prep);
+
+     This method is only required if the preparse() method is provided,
+     otherwise it is unused.  It cleans up anything attached to the
+     description, type_data and payload fields of the key_preparsed_payload
+     struct as filled in by the preparse() method.  It will always be called
+     after preparse() returns successfully, even if instantiate() or update()
+     succeed.
+
+
+ (*) int (*instantiate)(struct key *key, struct key_preparsed_payload *prep);
+
+     This method is called to attach a payload to a key during construction.
+     The payload attached need not bear any relation to the data passed to this
+     function.
+
+     The prep->data and prep->datalen fields will define the original payload
+     blob.  If preparse() was supplied then other fields may be filled in also.
+
+     If the amount of data attached to the key differs from the size in
+     keytype->def_datalen, then key_payload_reserve() should be called.
+
+     This method does not have to lock the key in order to attach a payload.
+     The fact that KEY_FLAG_INSTANTIATED is not set in key->flags prevents
+     anything else from gaining access to the key.
+
+     It is safe to sleep in this method.
+
+
+ (*) int (*update)(struct key *key, const void *data, size_t datalen);
+
+     If this type of key can be updated, then this method should be provided.
+     It is called to update a key's payload from the blob of data provided.
+
+     The prep->data and prep->datalen fields will define the original payload
+     blob.  If preparse() was supplied then other fields may be filled in also.
+
+     key_payload_reserve() should be called if the data length might change
+     before any changes are actually made. Note that if this succeeds, the type
+     is committed to changing the key because it's already been altered, so all
+     memory allocation must be done first.
+
+     The key will have its semaphore write-locked before this method is called,
+     but this only deters other writers; any changes to the key's payload must
+     be made under RCU conditions, and call_rcu() must be used to dispose of
+     the old payload.
+
+     key_payload_reserve() should be called before the changes are made, but
+     after all allocations and other potentially failing function calls are
+     made.
+
+     It is safe to sleep in this method.
+
+
+ (*) int (*match_preparse)(struct key_match_data *match_data);
+
+     This method is optional.  It is called when a key search is about to be
+     performed.  It is given the following structure:
+
+	struct key_match_data {
+		bool (*cmp)(const struct key *key,
+			    const struct key_match_data *match_data);
+		const void	*raw_data;
+		void		*preparsed;
+		unsigned	lookup_type;
+	};
+
+     On entry, raw_data will be pointing to the criteria to be used in matching
+     a key by the caller and should not be modified.  (*cmp)() will be pointing
+     to the default matcher function (which does an exact description match
+     against raw_data) and lookup_type will be set to indicate a direct lookup.
+
+     The following lookup_type values are available:
+
+      [*] KEYRING_SEARCH_LOOKUP_DIRECT - A direct lookup hashes the type and
+      	  description to narrow down the search to a small number of keys.
+
+      [*] KEYRING_SEARCH_LOOKUP_ITERATE - An iterative lookup walks all the
+      	  keys in the keyring until one is matched.  This must be used for any
+      	  search that's not doing a simple direct match on the key description.
+
+     The method may set cmp to point to a function of its choice that does some
+     other form of match, may set lookup_type to KEYRING_SEARCH_LOOKUP_ITERATE
+     and may attach something to the preparsed pointer for use by (*cmp)().
+     (*cmp)() should return true if a key matches and false otherwise.
+
+     If preparsed is set, it may be necessary to use the match_free() method to
+     clean it up.
+
+     The method should return 0 if successful or a negative error code
+     otherwise.
+
+     It is permitted to sleep in this method, but (*cmp)() may not sleep as
+     locks will be held over it.
+
+     If match_preparse() is not provided, keys of this type will be matched
+     exactly by their description.
+
+
+ (*) void (*match_free)(struct key_match_data *match_data);
+
+     This method is optional.  If given, it called to clean up
+     match_data->preparsed after a successful call to match_preparse().
+
+
+ (*) void (*revoke)(struct key *key);
+
+     This method is optional.  It is called to discard part of the payload
+     data upon a key being revoked.  The caller will have the key semaphore
+     write-locked.
+
+     It is safe to sleep in this method, though care should be taken to avoid
+     a deadlock against the key semaphore.
+
+
+ (*) void (*destroy)(struct key *key);
+
+     This method is optional. It is called to discard the payload data on a key
+     when it is being destroyed.
+
+     This method does not need to lock the key to access the payload; it can
+     consider the key as being inaccessible at this time. Note that the key's
+     type may have been changed before this function is called.
+
+     It is not safe to sleep in this method; the caller may hold spinlocks.
+
+
+ (*) void (*describe)(const struct key *key, struct seq_file *p);
+
+     This method is optional. It is called during /proc/keys reading to
+     summarise a key's description and payload in text form.
+
+     This method will be called with the RCU read lock held. rcu_dereference()
+     should be used to read the payload pointer if the payload is to be
+     accessed. key->datalen cannot be trusted to stay consistent with the
+     contents of the payload.
+
+     The description will not change, though the key's state may.
+
+     It is not safe to sleep in this method; the RCU read lock is held by the
+     caller.
+
+
+ (*) long (*read)(const struct key *key, char __user *buffer, size_t buflen);
+
+     This method is optional. It is called by KEYCTL_READ to translate the
+     key's payload into something a blob of data for userspace to deal with.
+     Ideally, the blob should be in the same format as that passed in to the
+     instantiate and update methods.
+
+     If successful, the blob size that could be produced should be returned
+     rather than the size copied.
+
+     This method will be called with the key's semaphore read-locked. This will
+     prevent the key's payload changing. It is not necessary to use RCU locking
+     when accessing the key's payload. It is safe to sleep in this method, such
+     as might happen when the userspace buffer is accessed.
+
+
+ (*) int (*request_key)(struct key_construction *cons, const char *op,
+			void *aux);
+
+     This method is optional.  If provided, request_key() and friends will
+     invoke this function rather than upcalling to /sbin/request-key to operate
+     upon a key of this type.
+
+     The aux parameter is as passed to request_key_async_with_auxdata() and
+     similar or is NULL otherwise.  Also passed are the construction record for
+     the key to be operated upon and the operation type (currently only
+     "create").
+
+     This method is permitted to return before the upcall is complete, but the
+     following function must be called under all circumstances to complete the
+     instantiation process, whether or not it succeeds, whether or not there's
+     an error:
+
+	void complete_request_key(struct key_construction *cons, int error);
+
+     The error parameter should be 0 on success, -ve on error.  The
+     construction record is destroyed by this action and the authorisation key
+     will be revoked.  If an error is indicated, the key under construction
+     will be negatively instantiated if it wasn't already instantiated.
+
+     If this method returns an error, that error will be returned to the
+     caller of request_key*().  complete_request_key() must be called prior to
+     returning.
+
+     The key under construction and the authorisation key can be found in the
+     key_construction struct pointed to by cons:
+
+     (*) struct key *key;
+
+     	 The key under construction.
+
+     (*) struct key *authkey;
+
+     	 The authorisation key.
+
+
+============================
+REQUEST-KEY CALLBACK SERVICE
+============================
+
+To create a new key, the kernel will attempt to execute the following command
+line:
+
+	/sbin/request-key create <key> <uid> <gid> \
+		<threadring> <processring> <sessionring> <callout_info>
+
+<key> is the key being constructed, and the three keyrings are the process
+keyrings from the process that caused the search to be issued. These are
+included for two reasons:
+
+  (1) There may be an authentication token in one of the keyrings that is
+      required to obtain the key, eg: a Kerberos Ticket-Granting Ticket.
+
+  (2) The new key should probably be cached in one of these rings.
+
+This program should set it UID and GID to those specified before attempting to
+access any more keys. It may then look around for a user specific process to
+hand the request off to (perhaps a path held in placed in another key by, for
+example, the KDE desktop manager).
+
+The program (or whatever it calls) should finish construction of the key by
+calling KEYCTL_INSTANTIATE or KEYCTL_INSTANTIATE_IOV, which also permits it to
+cache the key in one of the keyrings (probably the session ring) before
+returning.  Alternatively, the key can be marked as negative with KEYCTL_NEGATE
+or KEYCTL_REJECT; this also permits the key to be cached in one of the
+keyrings.
+
+If it returns with the key remaining in the unconstructed state, the key will
+be marked as being negative, it will be added to the session keyring, and an
+error will be returned to the key requestor.
+
+Supplementary information may be provided from whoever or whatever invoked this
+service. This will be passed as the <callout_info> parameter. If no such
+information was made available, then "-" will be passed as this parameter
+instead.
+
+
+Similarly, the kernel may attempt to update an expired or a soon to expire key
+by executing:
+
+	/sbin/request-key update <key> <uid> <gid> \
+		<threadring> <processring> <sessionring>
+
+In this case, the program isn't required to actually attach the key to a ring;
+the rings are provided for reference.
+
+
+==================
+GARBAGE COLLECTION
+==================
+
+Dead keys (for which the type has been removed) will be automatically unlinked
+from those keyrings that point to them and deleted as soon as possible by a
+background garbage collector.
+
+Similarly, revoked and expired keys will be garbage collected, but only after a
+certain amount of time has passed.  This time is set as a number of seconds in:
+
+	/proc/sys/kernel/keys/gc_delay
diff --git a/kernel/Documentation/security/tomoyo.txt b/kernel/Documentation/security/tomoyo.txt
new file mode 100644
index 000000000..200a2d37c
--- /dev/null
+++ b/kernel/Documentation/security/tomoyo.txt
@@ -0,0 +1,55 @@
+--- What is TOMOYO? ---
+
+TOMOYO is a name-based MAC extension (LSM module) for the Linux kernel.
+
+LiveCD-based tutorials are available at
+http://tomoyo.sourceforge.jp/1.7/1st-step/ubuntu10.04-live/
+http://tomoyo.sourceforge.jp/1.7/1st-step/centos5-live/ .
+Though these tutorials use non-LSM version of TOMOYO, they are useful for you
+to know what TOMOYO is.
+
+--- How to enable TOMOYO? ---
+
+Build the kernel with CONFIG_SECURITY_TOMOYO=y and pass "security=tomoyo" on
+kernel's command line.
+
+Please see http://tomoyo.sourceforge.jp/2.3/ for details.
+
+--- Where is documentation? ---
+
+User <-> Kernel interface documentation is available at
+http://tomoyo.sourceforge.jp/2.3/policy-reference.html .
+
+Materials we prepared for seminars and symposiums are available at
+http://sourceforge.jp/projects/tomoyo/docs/?category_id=532&language_id=1 .
+Below lists are chosen from three aspects.
+
+What is TOMOYO?
+  TOMOYO Linux Overview
+    http://sourceforge.jp/projects/tomoyo/docs/lca2009-takeda.pdf
+  TOMOYO Linux: pragmatic and manageable security for Linux
+    http://sourceforge.jp/projects/tomoyo/docs/freedomhectaipei-tomoyo.pdf
+  TOMOYO Linux: A Practical Method to Understand and Protect Your Own Linux Box
+    http://sourceforge.jp/projects/tomoyo/docs/PacSec2007-en-no-demo.pdf
+
+What can TOMOYO do?
+  Deep inside TOMOYO Linux
+    http://sourceforge.jp/projects/tomoyo/docs/lca2009-kumaneko.pdf
+  The role of "pathname based access control" in security.
+    http://sourceforge.jp/projects/tomoyo/docs/lfj2008-bof.pdf
+
+History of TOMOYO?
+  Realities of Mainlining
+    http://sourceforge.jp/projects/tomoyo/docs/lfj2008.pdf
+
+--- What is future plan? ---
+
+We believe that inode based security and name based security are complementary
+and both should be used together. But unfortunately, so far, we cannot enable
+multiple LSM modules at the same time. We feel sorry that you have to give up
+SELinux/SMACK/AppArmor etc. when you want to use TOMOYO.
+
+We hope that LSM becomes stackable in future. Meanwhile, you can use non-LSM
+version of TOMOYO, available at http://tomoyo.sourceforge.jp/1.7/ .
+LSM version of TOMOYO is a subset of non-LSM version of TOMOYO. We are planning
+to port non-LSM version's functionalities to LSM versions.