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Commit 9e2d8656 authored by Linus Torvalds's avatar Linus Torvalds
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Merge branch 'akpm' (Andrew's patch-bomb) 

Merge patches from Andrew Morton:
 "A few misc things and very nearly all of the MM tree.  A tremendous
  amount of stuff (again), including a significant rbtree library
  rework."

* emailed patches from Andrew Morton <akpm@linux-foundation.org>: (160 commits)
  sparc64: Support transparent huge pages.
  mm: thp: Use more portable PMD clearing sequenece in zap_huge_pmd().
  mm: Add and use update_mmu_cache_pmd() in transparent huge page code.
  sparc64: Document PGD and PMD layout.
  sparc64: Eliminate PTE table memory wastage.
  sparc64: Halve the size of PTE tables
  sparc64: Only support 4MB huge pages and 8KB base pages.
  memory-hotplug: suppress "Trying to free nonexistent resource <XXXXXXXXXXXXXXXX-YYYYYYYYYYYYYYYY>" warning
  mm: memcg: clean up mm_match_cgroup() signature
  mm: document PageHuge somewhat
  mm: use %pK for /proc/vmallocinfo
  mm, thp: fix mlock statistics
  mm, thp: fix mapped pages avoiding unevictable list on mlock
  memory-hotplug: update memory block's state and notify userspace
  memory-hotplug: preparation to notify memory block's state at memory hot remove
  mm: avoid section mismatch warning for memblock_type_name
  make GFP_NOTRACK definition unconditional
  cma: decrease cc.nr_migratepages after reclaiming pagelist
  CMA: migrate mlocked pages
  kpageflags: fix wrong KPF_THP on non-huge compound pages
  ...
parents 1ea4f4f8 9e695d2e
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Documentation/00-INDEX
View file @ 9e2d8656
......@@ -270,8 +270,6 @@ preempt-locking.txt
- info on locking under a preemptive kernel.
printk-formats.txt
- how to get printk format specifiers right
prio_tree.txt
- info on radix-priority-search-tree use for indexing vmas.
ramoops.txt
- documentation of the ramoops oops/panic logging module.
rbtree.txt
......
Documentation/ABI/obsolete/proc-pid-oom_adj deleted 100644 → 0
View file @ 1ea4f4f8
What: /proc/<pid>/oom_adj
When: August 2012
Why: /proc/<pid>/oom_adj allows userspace to influence the oom killer's
badness heuristic used to determine which task to kill when the kernel
is out of memory.
The badness heuristic has since been rewritten since the introduction of
this tunable such that its meaning is deprecated. The value was
implemented as a bitshift on a score generated by the badness()
function that did not have any precise units of measure. With the
rewrite, the score is given as a proportion of available memory to the
task allocating pages, so using a bitshift which grows the score
exponentially is, thus, impossible to tune with fine granularity.
A much more powerful interface, /proc/<pid>/oom_score_adj, was
introduced with the oom killer rewrite that allows users to increase or
decrease the badness score linearly. This interface will replace
/proc/<pid>/oom_adj.
A warning will be emitted to the kernel log if an application uses this
deprecated interface. After it is printed once, future warnings will be
suppressed until the kernel is rebooted.
Documentation/cgroups/memory.txt
View file @ 9e2d8656
......@@ -18,16 +18,16 @@ from the rest of the system. The article on LWN [12] mentions some probable
uses of the memory controller. The memory controller can be used to
a. Isolate an application or a group of applications
Memory hungry applications can be isolated and limited to a smaller
Memory-hungry applications can be isolated and limited to a smaller
amount of memory.
b. Create a cgroup with limited amount of memory, this can be used
b. Create a cgroup with a limited amount of memory; this can be used
as a good alternative to booting with mem=XXXX.
c. Virtualization solutions can control the amount of memory they want
to assign to a virtual machine instance.
d. A CD/DVD burner could control the amount of memory used by the
rest of the system to ensure that burning does not fail due to lack
of available memory.
e. There are several other use cases, find one or use the controller just
e. There are several other use cases; find one or use the controller just
for fun (to learn and hack on the VM subsystem).
Current Status: linux-2.6.34-mmotm(development version of 2010/April)
......@@ -38,12 +38,12 @@ Features:
- optionally, memory+swap usage can be accounted and limited.
- hierarchical accounting
- soft limit
- moving(recharging) account at moving a task is selectable.
- moving (recharging) account at moving a task is selectable.
- usage threshold notifier
- oom-killer disable knob and oom-notifier
- Root cgroup has no limit controls.
Kernel memory support is work in progress, and the current version provides
Kernel memory support is a work in progress, and the current version provides
basically functionality. (See Section 2.7)
Brief summary of control files.
......@@ -144,9 +144,9 @@ Figure 1 shows the important aspects of the controller
3. Each page has a pointer to the page_cgroup, which in turn knows the
cgroup it belongs to
The accounting is done as follows: mem_cgroup_charge() is invoked to setup
The accounting is done as follows: mem_cgroup_charge() is invoked to set up
the necessary data structures and check if the cgroup that is being charged
is over its limit. If it is then reclaim is invoked on the cgroup.
is over its limit. If it is, then reclaim is invoked on the cgroup.
More details can be found in the reclaim section of this document.
If everything goes well, a page meta-data-structure called page_cgroup is
updated. page_cgroup has its own LRU on cgroup.
......@@ -163,13 +163,13 @@ for earlier. A file page will be accounted for as Page Cache when it's
inserted into inode (radix-tree). While it's mapped into the page tables of
processes, duplicate accounting is carefully avoided.
A RSS page is unaccounted when it's fully unmapped. A PageCache page is
An RSS page is unaccounted when it's fully unmapped. A PageCache page is
unaccounted when it's removed from radix-tree. Even if RSS pages are fully
unmapped (by kswapd), they may exist as SwapCache in the system until they
are really freed. Such SwapCaches also also accounted.
are really freed. Such SwapCaches are also accounted.
A swapped-in page is not accounted until it's mapped.
Note: The kernel does swapin-readahead and read multiple swaps at once.
Note: The kernel does swapin-readahead and reads multiple swaps at once.
This means swapped-in pages may contain pages for other tasks than a task
causing page fault. So, we avoid accounting at swap-in I/O.
......@@ -209,7 +209,7 @@ memsw.limit_in_bytes.
Example: Assume a system with 4G of swap. A task which allocates 6G of memory
(by mistake) under 2G memory limitation will use all swap.
In this case, setting memsw.limit_in_bytes=3G will prevent bad use of swap.
By using memsw limit, you can avoid system OOM which can be caused by swap
By using the memsw limit, you can avoid system OOM which can be caused by swap
shortage.
* why 'memory+swap' rather than swap.
......@@ -217,7 +217,7 @@ The global LRU(kswapd) can swap out arbitrary pages. Swap-out means
to move account from memory to swap...there is no change in usage of
memory+swap. In other words, when we want to limit the usage of swap without
affecting global LRU, memory+swap limit is better than just limiting swap from
OS point of view.
an OS point of view.
* What happens when a cgroup hits memory.memsw.limit_in_bytes
When a cgroup hits memory.memsw.limit_in_bytes, it's useless to do swap-out
......@@ -236,7 +236,7 @@ an OOM routine is invoked to select and kill the bulkiest task in the
cgroup. (See 10. OOM Control below.)
The reclaim algorithm has not been modified for cgroups, except that
pages that are selected for reclaiming come from the per cgroup LRU
pages that are selected for reclaiming come from the per-cgroup LRU
list.
NOTE: Reclaim does not work for the root cgroup, since we cannot set any
......@@ -316,7 +316,7 @@ We can check the usage:
# cat /sys/fs/cgroup/memory/0/memory.usage_in_bytes
1216512
A successful write to this file does not guarantee a successful set of
A successful write to this file does not guarantee a successful setting of
this limit to the value written into the file. This can be due to a
number of factors, such as rounding up to page boundaries or the total
availability of memory on the system. The user is required to re-read
......@@ -350,7 +350,7 @@ Trying usual test under memory controller is always helpful.
4.1 Troubleshooting
Sometimes a user might find that the application under a cgroup is
terminated by OOM killer. There are several causes for this:
terminated by the OOM killer. There are several causes for this:
1. The cgroup limit is too low (just too low to do anything useful)
2. The user is using anonymous memory and swap is turned off or too low
......@@ -358,7 +358,7 @@ terminated by OOM killer. There are several causes for this:
A sync followed by echo 1 > /proc/sys/vm/drop_caches will help get rid of
some of the pages cached in the cgroup (page cache pages).
To know what happens, disable OOM_Kill by 10. OOM Control(see below) and
To know what happens, disabling OOM_Kill as per "10. OOM Control" (below) and
seeing what happens will be helpful.
4.2 Task migration
......@@ -399,10 +399,10 @@ About use_hierarchy, see Section 6.
Almost all pages tracked by this memory cgroup will be unmapped and freed.
Some pages cannot be freed because they are locked or in-use. Such pages are
moved to parent(if use_hierarchy==1) or root (if use_hierarchy==0) and this
moved to parent (if use_hierarchy==1) or root (if use_hierarchy==0) and this
cgroup will be empty.
Typical use case of this interface is that calling this before rmdir().
The typical use case for this interface is before calling rmdir().
Because rmdir() moves all pages to parent, some out-of-use page caches can be
moved to the parent. If you want to avoid that, force_empty will be useful.
......@@ -486,7 +486,7 @@ You can reset failcnt by writing 0 to failcnt file.
For efficiency, as other kernel components, memory cgroup uses some optimization
to avoid unnecessary cacheline false sharing. usage_in_bytes is affected by the
method and doesn't show 'exact' value of memory(and swap) usage, it's an fuzz
method and doesn't show 'exact' value of memory (and swap) usage, it's a fuzz
value for efficient access. (Of course, when necessary, it's synchronized.)
If you want to know more exact memory usage, you should use RSS+CACHE(+SWAP)
value in memory.stat(see 5.2).
......@@ -496,8 +496,8 @@ value in memory.stat(see 5.2).
This is similar to numa_maps but operates on a per-memcg basis. This is
useful for providing visibility into the numa locality information within
an memcg since the pages are allowed to be allocated from any physical
node. One of the usecases is evaluating application performance by
combining this information with the application's cpu allocation.
node. One of the use cases is evaluating application performance by
combining this information with the application's CPU allocation.
We export "total", "file", "anon" and "unevictable" pages per-node for
each memcg. The ouput format of memory.numa_stat is:
......@@ -561,10 +561,10 @@ are pushed back to their soft limits. If the soft limit of each control
group is very high, they are pushed back as much as possible to make
sure that one control group does not starve the others of memory.
Please note that soft limits is a best effort feature, it comes with
Please note that soft limits is a best-effort feature; it comes with
no guarantees, but it does its best to make sure that when memory is
heavily contended for, memory is allocated based on the soft limit
hints/setup. Currently soft limit based reclaim is setup such that
hints/setup. Currently soft limit based reclaim is set up such that
it gets invoked from balance_pgdat (kswapd).
7.1 Interface
......@@ -592,7 +592,7 @@ page tables.
8.1 Interface
This feature is disabled by default. It can be enabled(and disabled again) by
This feature is disabled by default. It can be enabledi (and disabled again) by
writing to memory.move_charge_at_immigrate of the destination cgroup.
If you want to enable it:
......@@ -601,8 +601,8 @@ If you want to enable it:
Note: Each bits of move_charge_at_immigrate has its own meaning about what type
of charges should be moved. See 8.2 for details.
Note: Charges are moved only when you move mm->owner, IOW, a leader of a thread
group.
Note: Charges are moved only when you move mm->owner, in other words,
a leader of a thread group.
Note: If we cannot find enough space for the task in the destination cgroup, we
try to make space by reclaiming memory. Task migration may fail if we
cannot make enough space.
......@@ -612,25 +612,25 @@ And if you want disable it again:
# echo 0 > memory.move_charge_at_immigrate
8.2 Type of charges which can be move
8.2 Type of charges which can be moved
Each bits of move_charge_at_immigrate has its own meaning about what type of
charges should be moved. But in any cases, it must be noted that an account of
a page or a swap can be moved only when it is charged to the task's current(old)
memory cgroup.
Each bit in move_charge_at_immigrate has its own meaning about what type of
charges should be moved. But in any case, it must be noted that an account of
a page or a swap can be moved only when it is charged to the task's current
(old) memory cgroup.
bit | what type of charges would be moved ?
-----+------------------------------------------------------------------------
0 | A charge of an anonymous page(or swap of it) used by the target task.
| You must enable Swap Extension(see 2.4) to enable move of swap charges.
0 | A charge of an anonymous page (or swap of it) used by the target task.
| You must enable Swap Extension (see 2.4) to enable move of swap charges.
-----+------------------------------------------------------------------------
1 | A charge of file pages(normal file, tmpfs file(e.g. ipc shared memory)
1 | A charge of file pages (normal file, tmpfs file (e.g. ipc shared memory)
| and swaps of tmpfs file) mmapped by the target task. Unlike the case of
| anonymous pages, file pages(and swaps) in the range mmapped by the task
| anonymous pages, file pages (and swaps) in the range mmapped by the task
| will be moved even if the task hasn't done page fault, i.e. they might
| not be the task's "RSS", but other task's "RSS" that maps the same file.
| And mapcount of the page is ignored(the page can be moved even if
| page_mapcount(page) > 1). You must enable Swap Extension(see 2.4) to
| And mapcount of the page is ignored (the page can be moved even if
| page_mapcount(page) > 1). You must enable Swap Extension (see 2.4) to
| enable move of swap charges.
8.3 TODO
......@@ -640,11 +640,11 @@ memory cgroup.
9. Memory thresholds
Memory cgroup implements memory thresholds using cgroups notification
Memory cgroup implements memory thresholds using the cgroups notification
API (see cgroups.txt). It allows to register multiple memory and memsw
thresholds and gets notifications when it crosses.
To register a threshold application need:
To register a threshold, an application must:
- create an eventfd using eventfd(2);
- open memory.usage_in_bytes or memory.memsw.usage_in_bytes;
- write string like "<event_fd> <fd of memory.usage_in_bytes> <threshold>" to
......@@ -659,24 +659,24 @@ It's applicable for root and non-root cgroup.
memory.oom_control file is for OOM notification and other controls.
Memory cgroup implements OOM notifier using cgroup notification
Memory cgroup implements OOM notifier using the cgroup notification
API (See cgroups.txt). It allows to register multiple OOM notification
delivery and gets notification when OOM happens.
To register a notifier, application need:
To register a notifier, an application must:
- create an eventfd using eventfd(2)
- open memory.oom_control file
- write string like "<event_fd> <fd of memory.oom_control>" to
cgroup.event_control
Application will be notified through eventfd when OOM happens.
OOM notification doesn't work for root cgroup.
The application will be notified through eventfd when OOM happens.
OOM notification doesn't work for the root cgroup.
You can disable OOM-killer by writing "1" to memory.oom_control file, as:
You can disable the OOM-killer by writing "1" to memory.oom_control file, as:
#echo 1 > memory.oom_control
This operation is only allowed to the top cgroup of sub-hierarchy.
This operation is only allowed to the top cgroup of a sub-hierarchy.
If OOM-killer is disabled, tasks under cgroup will hang/sleep
in memory cgroup's OOM-waitqueue when they request accountable memory.
......
Documentation/filesystems/proc.txt
View file @ 9e2d8656
......@@ -33,7 +33,7 @@ Table of Contents
2 Modifying System Parameters
3 Per-Process Parameters
3.1 /proc/<pid>/oom_adj & /proc/<pid>/oom_score_adj - Adjust the oom-killer
3.1 /proc/<pid>/oom_score_adj - Adjust the oom-killer
score
3.2 /proc/<pid>/oom_score - Display current oom-killer score
3.3 /proc/<pid>/io - Display the IO accounting fields
......@@ -1320,10 +1320,10 @@ of the kernel.
CHAPTER 3: PER-PROCESS PARAMETERS
------------------------------------------------------------------------------
3.1 /proc/<pid>/oom_adj & /proc/<pid>/oom_score_adj- Adjust the oom-killer score
3.1 /proc/<pid>/oom_score_adj- Adjust the oom-killer score
--------------------------------------------------------------------------------
These file can be used to adjust the badness heuristic used to select which
This file can be used to adjust the badness heuristic used to select which
process gets killed in out of memory conditions.
The badness heuristic assigns a value to each candidate task ranging from 0
......@@ -1361,22 +1361,10 @@ same system, cpuset, mempolicy, or memory controller resources to use at least
equivalent to discounting 50% of the task's allowed memory from being considered
as scoring against the task.
For backwards compatibility with previous kernels, /proc/<pid>/oom_adj may also
be used to tune the badness score. Its acceptable values range from -16
(OOM_ADJUST_MIN) to +15 (OOM_ADJUST_MAX) and a special value of -17
(OOM_DISABLE) to disable oom killing entirely for that task. Its value is
scaled linearly with /proc/<pid>/oom_score_adj.
Writing to /proc/<pid>/oom_score_adj or /proc/<pid>/oom_adj will change the
other with its scaled value.
The value of /proc/<pid>/oom_score_adj may be reduced no lower than the last
value set by a CAP_SYS_RESOURCE process. To reduce the value any lower
requires CAP_SYS_RESOURCE.
NOTICE: /proc/<pid>/oom_adj is deprecated and will be removed, please see
Documentation/feature-removal-schedule.txt.
Caveat: when a parent task is selected, the oom killer will sacrifice any first
generation children with separate address spaces instead, if possible. This
avoids servers and important system daemons from being killed and loses the
......@@ -1387,9 +1375,7 @@ minimal amount of work.
-------------------------------------------------------------
This file can be used to check the current score used by the oom-killer is for
any given <pid>. Use it together with /proc/<pid>/oom_adj to tune which
process should be killed in an out-of-memory situation.
any given <pid>.
3.3 /proc/<pid>/io - Display the IO accounting fields
-------------------------------------------------------
......
Documentation/memory.txt deleted 100644 → 0
View file @ 1ea4f4f8
There are several classic problems related to memory on Linux
systems.
1) There are some motherboards that will not cache above
a certain quantity of memory. If you have one of these
motherboards, your system will be SLOWER, not faster
as you add more memory. Consider exchanging your
motherboard.
All of these problems can be addressed with the "mem=XXXM" boot option
(where XXX is the size of RAM to use in megabytes).
It can also tell Linux to use less memory than is actually installed.
If you use "mem=" on a machine with PCI, consider using "memmap=" to avoid
physical address space collisions.
See the documentation of your boot loader (LILO, grub, loadlin, etc.) about
how to pass options to the kernel.
There are other memory problems which Linux cannot deal with. Random
corruption of memory is usually a sign of serious hardware trouble.
Try:
* Reducing memory settings in the BIOS to the most conservative
timings.
* Adding a cooling fan.
* Not overclocking your CPU.
* Having the memory tested in a memory tester or exchanged
with the vendor. Consider testing it with memtest86 yourself.
* Exchanging your CPU, cache, or motherboard for one that works.
Documentation/prio_tree.txt deleted 100644 → 0
View file @ 1ea4f4f8
The prio_tree.c code indexes vmas using 3 different indexes:
* heap_index = vm_pgoff + vm_size_in_pages : end_vm_pgoff
* radix_index = vm_pgoff : start_vm_pgoff
* size_index = vm_size_in_pages
A regular radix-priority-search-tree indexes vmas using only heap_index and
radix_index. The conditions for indexing are:
* ->heap_index >= ->left->heap_index &&
->heap_index >= ->right->heap_index
* if (->heap_index == ->left->heap_index)
then ->radix_index < ->left->radix_index;
* if (->heap_index == ->right->heap_index)
then ->radix_index < ->right->radix_index;
* nodes are hashed to left or right subtree using radix_index
similar to a pure binary radix tree.
A regular radix-priority-search-tree helps to store and query
intervals (vmas). However, a regular radix-priority-search-tree is only
suitable for storing vmas with different radix indices (vm_pgoff).
Therefore, the prio_tree.c extends the regular radix-priority-search-tree
to handle many vmas with the same vm_pgoff. Such vmas are handled in
2 different ways: 1) All vmas with the same radix _and_ heap indices are
linked using vm_set.list, 2) if there are many vmas with the same radix
index, but different heap indices and if the regular radix-priority-search
tree cannot index them all, we build an overflow-sub-tree that indexes such
vmas using heap and size indices instead of heap and radix indices. For
example, in the figure below some vmas with vm_pgoff = 0 (zero) are
indexed by regular radix-priority-search-tree whereas others are pushed
into an overflow-subtree. Note that all vmas in an overflow-sub-tree have
the same vm_pgoff (radix_index) and if necessary we build different
overflow-sub-trees to handle each possible radix_index. For example,
in figure we have 3 overflow-sub-trees corresponding to radix indices
0, 2, and 4.
In the final tree the first few (prio_tree_root->index_bits) levels
are indexed using heap and radix indices whereas the overflow-sub-trees below
those levels (i.e. levels prio_tree_root->index_bits + 1 and higher) are
indexed using heap and size indices. In overflow-sub-trees the size_index
is used for hashing the nodes to appropriate places.
Now, an example prio_tree:
vmas are represented [radix_index, size_index, heap_index]
i.e., [start_vm_pgoff, vm_size_in_pages, end_vm_pgoff]
level prio_tree_root->index_bits = 3
-----
_
0 [0,7,7] |
/ \ |
------------------ ------------ | Regular
/ \ | radix priority
1 [1,6,7] [4,3,7] | search tree
/ \ / \ |
------- ----- ------ ----- | heap-and-radix
/ \ / \ | indexed
2 [0,6,6] [2,5,7] [5,2,7] [6,1,7] |
/ \ / \ / \ / \ |
3 [0,5,5] [1,5,6] [2,4,6] [3,4,7] [4,2,6] [5,1,6] [6,0,6] [7,0,7] |
/ / / _
/ / / _
4 [0,4,4] [2,3,5] [4,1,5] |
/ / / |
5 [0,3,3] [2,2,4] [4,0,4] | Overflow-sub-trees
/ / |
6 [0,2,2] [2,1,3] | heap-and-size
/ / | indexed
7 [0,1,1] [2,0,2] |
/ |
8 [0,0,0] |
_
Note that we use prio_tree_root->index_bits to optimize the height
of the heap-and-radix indexed tree. Since prio_tree_root->index_bits is
set according to the maximum end_vm_pgoff mapped, we are sure that all
bits (in vm_pgoff) above prio_tree_root->index_bits are 0 (zero). Therefore,
we only use the first prio_tree_root->index_bits as radix_index.
Whenever index_bits is increased in prio_tree_expand, we shuffle the tree
to make sure that the first prio_tree_root->index_bits levels of the tree
is indexed properly using heap and radix indices.
We do not optimize the height of overflow-sub-trees using index_bits.
The reason is: there can be many such overflow-sub-trees and all of
them have to be suffled whenever the index_bits increases. This may involve
walking the whole prio_tree in prio_tree_insert->prio_tree_expand code
path which is not desirable. Hence, we do not optimize the height of the
heap-and-size indexed overflow-sub-trees using prio_tree->index_bits.
Instead the overflow sub-trees are indexed using full BITS_PER_LONG bits
of size_index. This may lead to skewed sub-trees because most of the
higher significant bits of the size_index are likely to be 0 (zero). In
the example above, all 3 overflow-sub-trees are skewed. This may marginally
affect the performance. However, processes rarely map many vmas with the
same start_vm_pgoff but different end_vm_pgoffs. Therefore, we normally
do not require overflow-sub-trees to index all vmas.
From the above discussion it is clear that the maximum height of
a prio_tree can be prio_tree_root->index_bits + BITS_PER_LONG.
However, in most of the common cases we do not need overflow-sub-trees,
so the tree height in the common cases will be prio_tree_root->index_bits.
It is fair to mention here that the prio_tree_root->index_bits
is increased on demand, however, the index_bits is not decreased when
vmas are removed from the prio_tree. That's tricky to do. Hence, it's
left as a home work problem.
Documentation/rbtree.txt
View file @ 9e2d8656
......@@ -193,24 +193,55 @@ Example:
Support for Augmented rbtrees
-----------------------------
Augmented rbtree is an rbtree with "some" additional data stored in each node.
This data can be used to augment some new functionality to rbtree.
Augmented rbtree is an optional feature built on top of basic rbtree
infrastructure. An rbtree user who wants this feature will have to call the
augmentation functions with the user provided augmentation callback
when inserting and erasing nodes.
On insertion, the user must call rb_augment_insert() once the new node is in
place. This will cause the augmentation function callback to be called for
each node between the new node and the root which has been affected by the
insertion.
When erasing a node, the user must call rb_augment_erase_begin() first to
retrieve the deepest node on the rebalance path. Then, after erasing the
original node, the user must call rb_augment_erase_end() with the deepest
node found earlier. This will cause the augmentation function to be called
for each affected node between the deepest node and the root.
Augmented rbtree is an rbtree with "some" additional data stored in
each node, where the additional data for node N must be a function of
the contents of all nodes in the subtree rooted at N. This data can
be used to augment some new functionality to rbtree. Augmented rbtree
is an optional feature built on top of basic rbtree infrastructure.
An rbtree user who wants this feature will have to call the augmentation
functions with the user provided augmentation callback when inserting
and erasing nodes.
C files implementing augmented rbtree manipulation must include
<linux/rbtree_augmented.h> instead of <linus/rbtree.h>. Note that
linux/rbtree_augmented.h exposes some rbtree implementations details
you are not expected to rely on; please stick to the documented APIs
there and do not include <linux/rbtree_augmented.h> from header files
either so as to minimize chances of your users accidentally relying on
such implementation details.
On insertion, the user must update the augmented information on the path
leading to the inserted node, then call rb_link_node() as usual and
rb_augment_inserted() instead of the usual rb_insert_color() call.
If rb_augment_inserted() rebalances the rbtree, it will callback into
a user provided function to update the augmented information on the
affected subtrees.
When erasing a node, the user must call rb_erase_augmented() instead of
rb_erase(). rb_erase_augmented() calls back into user provided functions
to updated the augmented information on affected subtrees.
In both cases, the callbacks are provided through struct rb_augment_callbacks.
3 callbacks must be defined:
- A propagation callback, which updates the augmented value for a given
node and its ancestors, up to a given stop point (or NULL to update
all the way to the root).
- A copy callback, which copies the augmented value for a given subtree
to a newly assigned subtree root.
- A tree rotation callback, which copies the augmented value for a given
subtree to a newly assigned subtree root AND recomputes the augmented
information for the former subtree root.
The compiled code for rb_erase_augmented() may inline the propagation and
copy callbacks, which results in a large function, so each augmented rbtree
user should have a single rb_erase_augmented() call site in order to limit
compiled code size.
Sample usage:
Interval tree is an example of augmented rb tree. Reference -
"Introduction to Algorithms" by Cormen, Leiserson, Rivest and Stein.
......@@ -230,26 +261,132 @@ and its immediate children. And this will be used in O(log n) lookup
for lowest match (lowest start address among all possible matches)
with something like:
find_lowest_match(lo, hi, node)
struct interval_tree_node *
interval_tree_first_match(struct rb_root *root,
unsigned long start, unsigned long last)
{
lowest_match = NULL;
while (node) {
if (max_hi(node->left) > lo) {
// Lowest overlap if any must be on left side
node = node->left;
} else if (overlap(lo, hi, node)) {
lowest_match = node;
break;
} else if (lo > node->lo) {
// Lowest overlap if any must be on right side
node = node->right;
} else {
break;
struct interval_tree_node *node;
if (!root->rb_node)
return NULL;
node = rb_entry(root->rb_node, struct interval_tree_node, rb);
while (true) {
if (node->rb.rb_left) {
struct interval_tree_node *left =
rb_entry(node->rb.rb_left,
struct interval_tree_node, rb);
if (left->__subtree_last >= start) {
/*
* Some nodes in left subtree satisfy Cond2.
* Iterate to find the leftmost such node N.
* If it also satisfies Cond1, that's the match
* we are looking for. Otherwise, there is no
* matching interval as nodes to the right of N
* can't satisfy Cond1 either.
*/
node = left;
continue;
}
}
if (node->start <= last) { /* Cond1 */
if (node->last >= start) /* Cond2 */
return node; /* node is leftmost match */
if (node->rb.rb_right) {
node = rb_entry(node->rb.rb_right,
struct interval_tree_node, rb);
if (node->__subtree_last >= start)
continue;
}
}
return NULL; /* No match */
}
}
Insertion/removal are defined using the following augmented callbacks:
static inline unsigned long
compute_subtree_last(struct interval_tree_node *node)
{
unsigned long max = node->last, subtree_last;
if (node->rb.rb_left) {
subtree_last = rb_entry(node->rb.rb_left,
struct interval_tree_node, rb)->__subtree_last;
if (max < subtree_last)
max = subtree_last;
}
if (node->rb.rb_right) {
subtree_last = rb_entry(node->rb.rb_right,
struct interval_tree_node, rb)->__subtree_last;
if (max < subtree_last)
max = subtree_last;
}
return max;
}
static void augment_propagate(struct rb_node *rb, struct rb_node *stop)
{
while (rb != stop) {
struct interval_tree_node *node =
rb_entry(rb, struct interval_tree_node, rb);
unsigned long subtree_last = compute_subtree_last(node);
if (node->__subtree_last == subtree_last)
break;
node->__subtree_last = subtree_last;
rb = rb_parent(&node->rb);
}
return lowest_match;
}
Finding exact match will be to first find lowest match and then to follow
successor nodes looking for exact match, until the start of a node is beyond
the hi value we are looking for.
static void augment_copy(struct rb_node *rb_old, struct rb_node *rb_new)
{
struct interval_tree_node *old =
rb_entry(rb_old, struct interval_tree_node, rb);
struct interval_tree_node *new =
rb_entry(rb_new, struct interval_tree_node, rb);
new->__subtree_last = old->__subtree_last;
}
static void augment_rotate(struct rb_node *rb_old, struct rb_node *rb_new)
{
struct interval_tree_node *old =
rb_entry(rb_old, struct interval_tree_node, rb);
struct interval_tree_node *new =
rb_entry(rb_new, struct interval_tree_node, rb);
new->__subtree_last = old->__subtree_last;
old->__subtree_last = compute_subtree_last(old);
}
static const struct rb_augment_callbacks augment_callbacks = {
augment_propagate, augment_copy, augment_rotate
};
void interval_tree_insert(struct interval_tree_node *node,
struct rb_root *root)
{
struct rb_node **link = &root->rb_node, *rb_parent = NULL;
unsigned long start = node->start, last = node->last;
struct interval_tree_node *parent;
while (*link) {
rb_parent = *link;
parent = rb_entry(rb_parent, struct interval_tree_node, rb);
if (parent->__subtree_last < last)
parent->__subtree_last = last;
if (start < parent->start)
link = &parent->rb.rb_left;
else
link = &parent->rb.rb_right;
}
node->__subtree_last = last;
rb_link_node(&node->rb, rb_parent, link);
rb_insert_augmented(&node->rb, root, &augment_callbacks);
}
void interval_tree_remove(struct interval_tree_node *node,
struct rb_root *root)
{
rb_erase_augmented(&node->rb, root, &augment_callbacks);
}
Documentation/vm/unevictable-lru.txt
View file @ 9e2d8656
......@@ -197,12 +197,8 @@ the pages are also "rescued" from the unevictable list in the process of
freeing them.
page_evictable() also checks for mlocked pages by testing an additional page
flag, PG_mlocked (as wrapped by PageMlocked()). If the page is NOT mlocked,
and a non-NULL VMA is supplied, page_evictable() will check whether the VMA is
VM_LOCKED via is_mlocked_vma(). is_mlocked_vma() will SetPageMlocked() and
update the appropriate statistics if the vma is VM_LOCKED. This method allows
efficient "culling" of pages in the fault path that are being faulted in to
VM_LOCKED VMAs.
flag, PG_mlocked (as wrapped by PageMlocked()), which is set when a page is
faulted into a VM_LOCKED vma, or found in a vma being VM_LOCKED.
VMSCAN'S HANDLING OF UNEVICTABLE PAGES
......@@ -371,8 +367,8 @@ mlock_fixup() filters several classes of "special" VMAs:
mlock_fixup() will call make_pages_present() in the hugetlbfs VMA range to
allocate the huge pages and populate the ptes.
3) VMAs with VM_DONTEXPAND or VM_RESERVED are generally userspace mappings of
kernel pages, such as the VDSO page, relay channel pages, etc. These pages
3) VMAs with VM_DONTEXPAND are generally userspace mappings of kernel pages,
such as the VDSO page, relay channel pages, etc. These pages
are inherently unevictable and are not managed on the LRU lists.
mlock_fixup() treats these VMAs the same as hugetlbfs VMAs. It calls
make_pages_present() to populate the ptes.
......@@ -651,7 +647,7 @@ PAGE RECLAIM IN shrink_*_list()
-------------------------------
shrink_active_list() culls any obviously unevictable pages - i.e.
!page_evictable(page, NULL) - diverting these to the unevictable list.
!page_evictable(page) - diverting these to the unevictable list.
However, shrink_active_list() only sees unevictable pages that made it onto the
active/inactive lru lists. Note that these pages do not have PageUnevictable
set - otherwise they would be on the unevictable list and shrink_active_list
......
MAINTAINERS
View file @ 9e2d8656
......@@ -7039,6 +7039,14 @@ S: Maintained
F: Documentation/svga.txt
F: arch/x86/boot/video*
SWIOTLB SUBSYSTEM
M: Konrad Rzeszutek Wilk <konrad.wilk@oracle.com>
L: linux-kernel@vger.kernel.org
S: Supported
F: lib/swiotlb.c
F: arch/*/kernel/pci-swiotlb.c
F: include/linux/swiotlb.h
SYSV FILESYSTEM
M: Christoph Hellwig <hch@infradead.org>
S: Maintained
......
arch/Kconfig
View file @ 9e2d8656
......@@ -313,4 +313,7 @@ config HAVE_IRQ_TIME_ACCOUNTING
Archs need to ensure they use a high enough resolution clock to
support irq time accounting and then call enable_sched_clock_irqtime().
config HAVE_ARCH_TRANSPARENT_HUGEPAGE
bool
source "kernel/gcov/Kconfig"
arch/alpha/kernel/pci-sysfs.c
View file @ 9e2d8656
......@@ -26,7 +26,7 @@ static int hose_mmap_page_range(struct pci_controller *hose,
base = sparse ? hose->sparse_io_base : hose->dense_io_base;
vma->vm_pgoff += base >> PAGE_SHIFT;
vma->vm_flags |= (VM_IO | VM_RESERVED);
vma->vm_flags |= VM_IO | VM_DONTEXPAND | VM_DONTDUMP;
return io_remap_pfn_range(vma, vma->vm_start, vma->vm_pgoff,
vma->vm_end - vma->vm_start,
......
arch/arm/Kconfig
View file @ 9e2d8656
......@@ -25,6 +25,7 @@ config ARM
select HAVE_FUNCTION_GRAPH_TRACER if (!THUMB2_KERNEL)
select ARCH_BINFMT_ELF_RANDOMIZE_PIE
select HAVE_GENERIC_DMA_COHERENT
select HAVE_DEBUG_KMEMLEAK
select HAVE_KERNEL_GZIP
select HAVE_KERNEL_LZO
select HAVE_KERNEL_LZMA
......@@ -39,6 +40,7 @@ config ARM
select HARDIRQS_SW_RESEND
select GENERIC_IRQ_PROBE
select GENERIC_IRQ_SHOW
select HAVE_UID16
select ARCH_WANT_IPC_PARSE_VERSION
select HARDIRQS_SW_RESEND
select CPU_PM if (SUSPEND || CPU_IDLE)
......
arch/arm/mm/fault-armv.c
View file @ 9e2d8656
......@@ -134,7 +134,6 @@ make_coherent(struct address_space *mapping, struct vm_area_struct *vma,
{
struct mm_struct *mm = vma->vm_mm;
struct vm_area_struct *mpnt;
struct prio_tree_iter iter;
unsigned long offset;
pgoff_t pgoff;
int aliases = 0;
......@@ -147,7 +146,7 @@ make_coherent(struct address_space *mapping, struct vm_area_struct *vma,
* cache coherency.
*/
flush_dcache_mmap_lock(mapping);
vma_prio_tree_foreach(mpnt, &iter, &mapping->i_mmap, pgoff, pgoff) {
vma_interval_tree_foreach(mpnt, &mapping->i_mmap, pgoff, pgoff) {
/*
* If this VMA is not in our MM, we can ignore it.
* Note that we intentionally mask out the VMA
......
arch/arm/mm/fault.c
View file @ 9e2d8656
......@@ -336,6 +336,7 @@ do_page_fault(unsigned long addr, unsigned int fsr, struct pt_regs *regs)
/* Clear FAULT_FLAG_ALLOW_RETRY to avoid any risk
* of starvation. */
flags &= ~FAULT_FLAG_ALLOW_RETRY;
flags |= FAULT_FLAG_TRIED;
goto retry;
}
}
......
arch/arm/mm/flush.c
View file @ 9e2d8656
......@@ -196,7 +196,6 @@ static void __flush_dcache_aliases(struct address_space *mapping, struct page *p
{
struct mm_struct *mm = current->active_mm;
struct vm_area_struct *mpnt;
struct prio_tree_iter iter;
pgoff_t pgoff;
/*
......@@ -208,7 +207,7 @@ static void __flush_dcache_aliases(struct address_space *mapping, struct page *p
pgoff = page->index << (PAGE_CACHE_SHIFT - PAGE_SHIFT);
flush_dcache_mmap_lock(mapping);
vma_prio_tree_foreach(mpnt, &iter, &mapping->i_mmap, pgoff, pgoff) {
vma_interval_tree_foreach(mpnt, &mapping->i_mmap, pgoff, pgoff) {
unsigned long offset;
/*
......
arch/arm64/Kconfig
View file @ 9e2d8656
......@@ -10,6 +10,8 @@ config ARM64
select GENERIC_TIME_VSYSCALL
select HARDIRQS_SW_RESEND
select HAVE_ARCH_TRACEHOOK
select HAVE_DEBUG_BUGVERBOSE
select HAVE_DEBUG_KMEMLEAK
select HAVE_DMA_API_DEBUG
select HAVE_DMA_ATTRS
select HAVE_GENERIC_DMA_COHERENT
......@@ -26,6 +28,7 @@ config ARM64
select PERF_USE_VMALLOC
select RTC_LIB
select SPARSE_IRQ
select SYSCTL_EXCEPTION_TRACE
help
ARM 64-bit (AArch64) Linux support.
......@@ -193,6 +196,7 @@ config COMPAT
bool "Kernel support for 32-bit EL0"
depends on !ARM64_64K_PAGES
select COMPAT_BINFMT_ELF
select HAVE_UID16
help
This option enables support for a 32-bit EL0 running under a 64-bit
kernel at EL1. AArch32-specific components such as system calls,
......
arch/avr32/mm/fault.c
View file @ 9e2d8656
......@@ -152,6 +152,7 @@ asmlinkage void do_page_fault(unsigned long ecr, struct pt_regs *regs)
tsk->min_flt++;
if (fault & VM_FAULT_RETRY) {
flags &= ~FAULT_FLAG_ALLOW_RETRY;
flags |= FAULT_FLAG_TRIED;
/*
* No need to up_read(&mm->mmap_sem) as we would have
......
arch/blackfin/Kconfig
View file @ 9e2d8656
......@@ -33,6 +33,7 @@ config BLACKFIN
select HAVE_PERF_EVENTS
select ARCH_HAVE_CUSTOM_GPIO_H
select ARCH_WANT_OPTIONAL_GPIOLIB
select HAVE_UID16
select ARCH_WANT_IPC_PARSE_VERSION
select HAVE_GENERIC_HARDIRQS
select GENERIC_ATOMIC64
......
arch/cris/Kconfig
View file @ 9e2d8656
......@@ -42,6 +42,7 @@ config CRIS
select HAVE_IDE
select GENERIC_ATOMIC64
select HAVE_GENERIC_HARDIRQS
select HAVE_UID16
select ARCH_WANT_IPC_PARSE_VERSION
select GENERIC_IRQ_SHOW
select GENERIC_IOMAP
......
arch/cris/mm/fault.c
View file @ 9e2d8656
......@@ -186,6 +186,7 @@ do_page_fault(unsigned long address, struct pt_regs *regs,
tsk->min_flt++;
if (fault & VM_FAULT_RETRY) {
flags &= ~FAULT_FLAG_ALLOW_RETRY;
flags |= FAULT_FLAG_TRIED;
/*
* No need to up_read(&mm->mmap_sem) as we would
......
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