- 12 Aug, 2020 34 commits
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Mike Kravetz authored
The routine cma_init_reserved_areas is designed to activate all reserved cma areas. It quits when it first encounters an error. This can leave some areas in a state where they are reserved but not activated. There is no feedback to code which performed the reservation. Attempting to allocate memory from areas in such a state will result in a BUG. Modify cma_init_reserved_areas to always attempt to activate all areas. The called routine, cma_activate_area is responsible for leaving the area in a valid state. No one is making active use of returned error codes, so change the routine to void. How to reproduce: This example uses kernelcore, hugetlb and cma as an easy way to reproduce. However, this is a more general cma issue. Two node x86 VM 16GB total, 8GB per node Kernel command line parameters, kernelcore=4G hugetlb_cma=8G Related boot time messages, hugetlb_cma: reserve 8192 MiB, up to 4096 MiB per node cma: Reserved 4096 MiB at 0x0000000100000000 hugetlb_cma: reserved 4096 MiB on node 0 cma: Reserved 4096 MiB at 0x0000000300000000 hugetlb_cma: reserved 4096 MiB on node 1 cma: CMA area hugetlb could not be activated # echo 8 > /sys/kernel/mm/hugepages/hugepages-1048576kB/nr_hugepages BUG: kernel NULL pointer dereference, address: 0000000000000000 #PF: supervisor read access in kernel mode #PF: error_code(0x0000) - not-present page PGD 0 P4D 0 Oops: 0000 [#1] SMP PTI ... Call Trace: bitmap_find_next_zero_area_off+0x51/0x90 cma_alloc+0x1a5/0x310 alloc_fresh_huge_page+0x78/0x1a0 alloc_pool_huge_page+0x6f/0xf0 set_max_huge_pages+0x10c/0x250 nr_hugepages_store_common+0x92/0x120 ? __kmalloc+0x171/0x270 kernfs_fop_write+0xc1/0x1a0 vfs_write+0xc7/0x1f0 ksys_write+0x5f/0xe0 do_syscall_64+0x4d/0x90 entry_SYSCALL_64_after_hwframe+0x44/0xa9 Fixes: c64be2bb ("drivers: add Contiguous Memory Allocator") Signed-off-by:Mike Kravetz <mike.kravetz@oracle.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Reviewed-by:
Roman Gushchin <guro@fb.com> Acked-by:
Barry Song <song.bao.hua@hisilicon.com> Cc: Marek Szyprowski <m.szyprowski@samsung.com> Cc: Michal Nazarewicz <mina86@mina86.com> Cc: Kyungmin Park <kyungmin.park@samsung.com> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Cc: <stable@vger.kernel.org> Link: http://lkml.kernel.org/r/20200730163123.6451-1-mike.kravetz@oracle.comSigned-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Barry Song authored
Once we enable CMA_DEBUGFS, we will get the below errors: directory 'cma-hugetlb' with parent 'cma' already present. We should have different names for different CMA areas. Signed-off-by:
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Barry Song authored
Patch series "mm: fix the names of general cma and hugetlb cma", v2. The current code of CMA can only work when users pass a const string as name parameter. we need to fix the way to handle names in CMA. On the other hand, to avoid name conflicts after enabling CMA_DEBUGFS, each hugetlb should get a different CMA name. This patch (of 2): If users give a name saved in stack, the current code will generate magic pointer. if users don't give a name(NULL), kasprintf() will always return NULL as we are at the early stage. that means cma_init_reserved_mem() will return -ENOMEM if users set name parameter as NULL. [natechancellor@gmail.com: return cma->name directly in cma_get_name] Link: https://github.com/ClangBuiltLinux/linux/issues/1063 Link: http://lkml.kernel.org/r/20200623015840.621964-1-natechancellor@gmail.comSigned-off-by:
Nathan Chancellor <natechancellor@gmail.com> Signed-off-by:
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Jianqun Xu authored
In some case the cma area could not be activated, but the cma_alloc be used under this case, then the kernel will crash caused by NULL pointer dereference. Add bitmap valid check in cma_alloc to avoid this issue. Signed-off-by:
Jianqun Xu <jay.xu@rock-chips.com> Signed-off-by:
David Hildenbrand <david@redhat.com> Link: http://lkml.kernel.org/r/20200615010123.15596-1-jay.xu@rock-chips.comSigned-off-by:
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Anshuman Khandual authored
Add following new vmstat events which will help in validating THP migration without split. Statistics reported through these new VM events will help in performance debugging. 1. THP_MIGRATION_SUCCESS 2. THP_MIGRATION_FAILURE 3. THP_MIGRATION_SPLIT In addition, these new events also update normal page migration statistics appropriately via PGMIGRATE_SUCCESS and PGMIGRATE_FAILURE. While here, this updates current trace event 'mm_migrate_pages' to accommodate now available THP statistics. [akpm@linux-foundation.org: s/hpage_nr_pages/thp_nr_pages/] [ziy@nvidia.com: v2] Link: http://lkml.kernel.org/r/C5E3C65C-8253-4638-9D3C-71A61858BB8B@nvidia.com [anshuman.khandual@arm.com: s/thp_nr_pages/hpage_nr_pages/] Link: http://lkml.kernel.org/r/1594287583-16568-1-git-send-email-anshuman.khandual@arm.comSigned-off-by:
Anshuman Khandual <anshuman.khandual@arm.com> Signed-off-by:
Zi Yan <ziy@nvidia.com> Signed-off-by:
Daniel Jordan <daniel.m.jordan@oracle.com> Cc: Hugh Dickins <hughd@google.com> Cc: Matthew Wilcox <willy@infradead.org> Cc: Zi Yan <ziy@nvidia.com> Cc: John Hubbard <jhubbard@nvidia.com> Cc: Naoya Horiguchi <n-horiguchi@ah.jp.nec.com> Link: http://lkml.kernel.org/r/1594080415-27924-1-git-send-email-anshuman.khandual@arm.comSigned-off-by:
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Yang Shi authored
Since commit 3917c802 ("thp: change CoW semantics for anon-THP"), the CoW page fault of THP has been rewritten, debug_cow is not used anymore. So, just remove it. Signed-off-by:
Yang Shi <yang.shi@linux.alibaba.com> Signed-off-by:
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Ralph Campbell authored
Add a migrate_vma_*() self test for mmap(MAP_SHARED) to verify that !vma_anonymous() ranges won't be migrated. Signed-off-by:
Ralph Campbell <rcampbell@nvidia.com> Signed-off-by:
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Ralph Campbell authored
Patch series "mm/migrate: optimize migrate_vma_setup() for holes". A simple optimization for migrate_vma_*() when the source vma is not an anonymous vma and a new test case to exercise it. This patch (of 2): When migrating system memory to device private memory, if the source address range is a valid VMA range and there is no memory or a zero page, the source PFN array is marked as valid but with no PFN. This lets the device driver allocate private memory and clear it, then insert the new device private struct page into the CPU's page tables when migrate_vma_pages() is called. migrate_vma_pages() only inserts the new page if the VMA is an anonymous range. There is no point in telling the device driver to allocate device private memory and then not migrate the page. Instead, mark the source PFN array entries as not migrating to avoid this overhead. [rcampbell@nvidia.com: v2] Link: http://lkml.kernel.org/r/20200710194840.7602-2-rcampbell@nvidia.comSigned-off-by:
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Mike Kravetz authored
Commit c0d0381a ("hugetlbfs: use i_mmap_rwsem for more pmd sharing synchronization") requires callers of huge_pte_alloc to hold i_mmap_rwsem in at least read mode. This is because the explicit locking in huge_pmd_share (called by huge_pte_alloc) was removed. When restructuring the code, the call to huge_pte_alloc in the else block at the beginning of hugetlb_fault was missed. Unfortunately, that else clause is exercised when there is no page table entry. This will likely lead to a call to huge_pmd_share. If huge_pmd_share thinks pmd sharing is possible, it will traverse the mapping tree (i_mmap) without holding i_mmap_rwsem. If someone else is modifying the tree, bad things such as addressing exceptions or worse could happen. Simply remove the else clause. It should have been removed previously. The code following the else will call huge_pte_alloc with the appropriate locking. To prevent this type of issue in the future, add routines to assert that i_mmap_rwsem is held, and call these routines in huge pmd sharing routines. Fixes: c0d0381a ("hugetlbfs: use i_mmap_rwsem for more pmd sharing synchronization") Suggested-by:
Matthew Wilcox <willy@infradead.org> Signed-off-by:
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Mike Kravetz authored
syzbot found issues with having hugetlbfs on a union/overlay as reported in [1]. Due to the limitations (no write) and special functionality of hugetlbfs, it does not work well in filesystem stacking. There are no know use cases for hugetlbfs stacking. Rather than making modifications to get hugetlbfs working in such environments, simply prevent stacking. [1] https://lore.kernel.org/linux-mm/000000000000b4684e05a2968ca6@google.com/ Reported-by: syzbot+d6ec23007e951dadf3de@syzkaller.appspotmail.com Suggested-by:
Amir Goldstein <amir73il@gmail.com> Signed-off-by:
Miklos Szeredi <mszeredi@redhat.com> Cc: Al Viro <viro@zeniv.linux.org.uk> Cc: Matthew Wilcox <willy@infradead.org> Cc: Colin Walters <walters@verbum.org> Link: http://lkml.kernel.org/r/80f869aa-810d-ef6c-8888-b46cee135907@oracle.comSigned-off-by:
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Yafang Shao authored
When the OOM killer finds a victim and tryies to kill it, if the victim is already exiting, the task mm will be NULL and no process will be killed. But the dump_header() has been already executed, so it will be strange to dump so much information without killing a process. We'd better show some helpful information to indicate why this happens. Suggested-by:
David Rientjes <rientjes@google.com> Signed-off-by:
Yafang Shao <laoar.shao@gmail.com> Signed-off-by:
Michal Hocko <mhocko@suse.com> Cc: Tetsuo Handa <penguin-kernel@i-love.sakura.ne.jp> Cc: Qian Cai <cai@lca.pw> Link: http://lkml.kernel.org/r/20200721010127.17238-1-laoar.shao@gmail.comSigned-off-by:
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Michal Hocko authored
The exported value includes oom_score_adj so the range is no [0, 1000] as described in the previous section but rather [0, 2000]. Mention that fact explicitly. Signed-off-by:
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Michal Hocko authored
There are at least two notes in the oom section. The 3% discount for root processes is gone since d46078b2 ("mm, oom: remove 3% bonus for CAP_SYS_ADMIN processes"). Likewise children of the selected oom victim are not sacrificed since bbbe4802 ("mm, oom: remove 'prefer children over parent' heuristic") Drop both of them. Signed-off-by:
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Yafang Shao authored
Recently we found an issue on our production environment that when memcg oom is triggered the oom killer doesn't chose the process with largest resident memory but chose the first scanned process. Note that all processes in this memcg have the same oom_score_adj, so the oom killer should chose the process with largest resident memory. Bellow is part of the oom info, which is enough to analyze this issue. [7516987.983223] memory: usage 16777216kB, limit 16777216kB, failcnt 52843037 [7516987.983224] memory+swap: usage 16777216kB, limit 9007199254740988kB, failcnt 0 [7516987.983225] kmem: usage 301464kB, limit 9007199254740988kB, failcnt 0 [...] [7516987.983293] [ pid ] uid tgid total_vm rss pgtables_bytes swapents oom_score_adj name [7516987.983510] [ 5740] 0 5740 257 1 32768 0 -998 pause [7516987.983574] [58804] 0 58804 4594 771 81920 0 -998 entry_point.bas [7516987.983577] [58908] 0 58908 7089 689 98304 0 -998 cron [7516987.983580] [58910] 0 58910 16235 5576 163840 0 -998 supervisord [7516987.983590] [59620] 0 59620 18074 1395 188416 0 -998 sshd [7516987.983594] [59622] 0 59622 18680 6679 188416 0 -998 python [7516987.983598] [59624] 0 59624 1859266 5161 548864 0 -998 odin-agent [7516987.983600] [59625] 0 59625 707223 9248 983040 0 -998 filebeat [7516987.983604] [59627] 0 59627 416433 64239 774144 0 -998 odin-log-agent [7516987.983607] [59631] 0 59631 180671 15012 385024 0 -998 python3 [7516987.983612] [61396] 0 61396 791287 3189 352256 0 -998 client [7516987.983615] [61641] 0 61641 1844642 29089 946176 0 -998 client [7516987.983765] [ 9236] 0 9236 2642 467 53248 0 -998 php_scanner [7516987.983911] [42898] 0 42898 15543 838 167936 0 -998 su [7516987.983915] [42900] 1000 42900 3673 867 77824 0 -998 exec_script_vr2 [7516987.983918] [42925] 1000 42925 36475 19033 335872 0 -998 python [7516987.983921] [57146] 1000 57146 3673 848 73728 0 -998 exec_script_J2p [7516987.983925] [57195] 1000 57195 186359 22958 491520 0 -998 python2 [7516987.983928] [58376] 1000 58376 275764 14402 290816 0 -998 rosmaster [7516987.983931] [58395] 1000 58395 155166 4449 245760 0 -998 rosout [7516987.983935] [58406] 1000 58406 18285584 3967322 37101568 0 -998 data_sim [7516987.984221] oom-kill:constraint=CONSTRAINT_MEMCG,nodemask=(null),cpuset=3aa16c9482ae3a6f6b78bda68a55d32c87c99b985e0f11331cddf05af6c4d753,mems_allowed=0-1,oom_memcg=/kubepods/podf1c273d3-9b36-11ea-b3df-246e9693c184,task_memcg=/kubepods/podf1c273d3-9b36-11ea-b3df-246e9693c184/1f246a3eeea8f70bf91141eeaf1805346a666e225f823906485ea0b6c37dfc3d,task=pause,pid=5740,uid=0 [7516987.984254] Memory cgroup out of memory: Killed process 5740 (pause) total-vm:1028kB, anon-rss:4kB, file-rss:0kB, shmem-rss:0kB [7516988.092344] oom_reaper: reaped process 5740 (pause), now anon-rss:0kB, file-rss:0kB, shmem-rss:0kB We can find that the first scanned process 5740 (pause) was killed, but its rss is only one page. That is because, when we calculate the oom badness in oom_badness(), we always ignore the negtive point and convert all of these negtive points to 1. Now as oom_score_adj of all the processes in this targeted memcg have the same value -998, the points of these processes are all negtive value. As a result, the first scanned process will be killed. The oom_socre_adj (-998) in this memcg is set by kubelet, because it is a a Guaranteed pod, which has higher priority to prevent from being killed by system oom. To fix this issue, we should make the calculation of oom point more accurate. We can achieve it by convert the chosen_point from 'unsigned long' to 'long'. [cai@lca.pw: reported a issue in the previous version] [mhocko@suse.com: fixed the issue reported by Cai] [mhocko@suse.com: add the comment in proc_oom_score()] [laoar.shao@gmail.com: v3] Link: http://lkml.kernel.org/r/1594396651-9931-1-git-send-email-laoar.shao@gmail.comSigned-off-by:
Naresh Kamboju <naresh.kamboju@linaro.org> Acked-by:
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Yanfei Xu authored
Change "interlave" to "interleave". Signed-off-by:
Yanfei Xu <yanfei.xu@windriver.com> Signed-off-by:
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Wenchao Hao authored
Previous implementatoin calls untagged_addr() before error check, while if the error check failed and return EINVAL, the untagged_addr() call is just useless work. Signed-off-by:
Wenchao Hao <haowenchao22@gmail.com> Signed-off-by:
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Krzysztof Kozlowski authored
Fix W=1 compile warnings (invalid kerneldoc): mm/mempolicy.c:137: warning: Function parameter or member 'node' not described in 'numa_map_to_online_node' mm/mempolicy.c:137: warning: Excess function parameter 'nid' description in 'numa_map_to_online_node' Signed-off-by:Krzysztof Kozlowski <krzk@kernel.org> Signed-off-by:
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Alex Shi authored
There is no compact_defer_limit. It should be compact_defer_shift in use. and add compact_order_failed explanation. Signed-off-by:
Alex Shi <alex.shi@linux.alibaba.com> Signed-off-by:
Alexander Duyck <alexander.h.duyck@linux.intel.com> Link: http://lkml.kernel.org/r/3bd60e1b-a74e-050d-ade4-6e8f54e00b92@linux.alibaba.comSigned-off-by:
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Nitin Gupta authored
Proactive compaction uses per-node/zone "fragmentation score" which is always in range [0, 100], so use unsigned type of these scores as well as for related constants. Signed-off-by:
Nitin Gupta <nigupta@nvidia.com> Signed-off-by:
Baoquan He <bhe@redhat.com> Cc: Luis Chamberlain <mcgrof@kernel.org> Cc: Kees Cook <keescook@chromium.org> Cc: Iurii Zaikin <yzaikin@google.com> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Link: http://lkml.kernel.org/r/20200618010319.13159-1-nigupta@nvidia.comSigned-off-by:
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Nitin Gupta authored
Fix compile error when COMPACTION_HPAGE_ORDER is assigned to HUGETLB_PAGE_ORDER. The correct way to check if this constant is defined is to check for CONFIG_HUGETLBFS. Reported-by:
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Nitin Gupta authored
For some applications, we need to allocate almost all memory as hugepages. However, on a running system, higher-order allocations can fail if the memory is fragmented. Linux kernel currently does on-demand compaction as we request more hugepages, but this style of compaction incurs very high latency. Experiments with one-time full memory compaction (followed by hugepage allocations) show that kernel is able to restore a highly fragmented memory state to a fairly compacted memory state within <1 sec for a 32G system. Such data suggests that a more proactive compaction can help us allocate a large fraction of memory as hugepages keeping allocation latencies low. For a more proactive compaction, the approach taken here is to define a new sysctl called 'vm.compaction_proactiveness' which dictates bounds for external fragmentation which kcompactd tries to maintain. The tunable takes a value in range [0, 100], with a default of 20. Note that a previous version of this patch [1] was found to introduce too many tunables (per-order extfrag{low, high}), but this one reduces them to just one sysctl. Also, the new tunable is an opaque value instead of asking for specific bounds of "external fragmentation", which would have been difficult to estimate. The internal interpretation of this opaque value allows for future fine-tuning. Currently, we use a simple translation from this tunable to [low, high] "fragmentation score" thresholds (low=100-proactiveness, high=low+10%). The score for a node is defined as weighted mean of per-zone external fragmentation. A zone's present_pages determines its weight. To periodically check per-node score, we reuse per-node kcompactd threads, which are woken up every 500 milliseconds to check the same. If a node's score exceeds its high threshold (as derived from user-provided proactiveness value), proactive compaction is started until its score reaches its low threshold value. By default, proactiveness is set to 20, which implies threshold values of low=80 and high=90. This patch is largely based on ideas from Michal Hocko [2]. See also the LWN article [3]. Performance data ================ System: x64_64, 1T RAM, 80 CPU threads. Kernel: 5.6.0-rc3 + this patch echo madvise | sudo tee /sys/kernel/mm/transparent_hugepage/enabled echo madvise | sudo tee /sys/kernel/mm/transparent_hugepage/defrag Before starting the driver, the system was fragmented from a userspace program that allocates all memory and then for each 2M aligned section, frees 3/4 of base pages using munmap. The workload is mainly anonymous userspace pages, which are easy to move around. I intentionally avoided unmovable pages in this test to see how much latency we incur when hugepage allocations hit direct compaction. 1. Kernel hugepage allocation latencies With the system in such a fragmented state, a kernel driver then allocates as many hugepages as possible and measures allocation latency: (all latency values are in microseconds) - With vanilla 5.6.0-rc3 percentile latency –––––––––– ––––––– 5 7894 10 9496 25 12561 30 15295 40 18244 50 21229 60 27556 75 30147 80 31047 90 32859 95 33799 Total 2M hugepages allocated = 383859 (749G worth of hugepages out of 762G total free => 98% of free memory could be allocated as hugepages) - With 5.6.0-rc3 + this patch, with proactiveness=20 sysctl -w vm.compaction_proactiveness=20 percentile latency –––––––––– ––––––– 5 2 10 2 25 3 30 3 40 3 50 4 60 4 75 4 80 4 90 5 95 429 Total 2M hugepages allocated = 384105 (750G worth of hugepages out of 762G total free => 98% of free memory could be allocated as hugepages) 2. JAVA heap allocation In this test, we first fragment memory using the same method as for (1). Then, we start a Java process with a heap size set to 700G and request the heap to be allocated with THP hugepages. We also set THP to madvise to allow hugepage backing of this heap. /usr/bin/time java -Xms700G -Xmx700G -XX:+UseTransparentHugePages -XX:+AlwaysPreTouch The above command allocates 700G of Java heap using hugepages. - With vanilla 5.6.0-rc3 17.39user 1666.48system 27:37.89elapsed - With 5.6.0-rc3 + this patch, with proactiveness=20 8.35user 194.58system 3:19.62elapsed Elapsed time remains around 3:15, as proactiveness is further increased. Note that proactive compaction happens throughout the runtime of these workloads. The situation of one-time compaction, sufficient to supply hugepages for following allocation stream, can probably happen for more extreme proactiveness values, like 80 or 90. In the above Java workload, proactiveness is set to 20. The test starts with a node's score of 80 or higher, depending on the delay between the fragmentation step and starting the benchmark, which gives more-or-less time for the initial round of compaction. As t he benchmark consumes hugepages, node's score quickly rises above the high threshold (90) and proactive compaction starts again, which brings down the score to the low threshold level (80). Repeat. bpftrace also confirms proactive compaction running 20+ times during the runtime of this Java benchmark. kcompactd threads consume 100% of one of the CPUs while it tries to bring a node's score within thresholds. Backoff behavior ================ Above workloads produce a memory state which is easy to compact. However, if memory is filled with unmovable pages, proactive compaction should essentially back off. To test this aspect: - Created a kernel driver that allocates almost all memory as hugepages followed by freeing first 3/4 of each hugepage. - Set proactiveness=40 - Note that proactive_compact_node() is deferred maximum number of times with HPAGE_FRAG_CHECK_INTERVAL_MSEC of wait between each check (=> ~30 seconds between retries). [1] https://patchwork.kernel.org/patch/11098289/ [2] https://lore.kernel.org/linux-mm/20161230131412.GI13301@dhcp22.suse.cz/ [3] https://lwn.net/Articles/817905/Signed-off-by:Oleksandr Natalenko <oleksandr@redhat.com> Reviewed-by:
Vlastimil Babka <vbabka@suse.cz> Reviewed-by:
Khalid Aziz <khalid.aziz@oracle.com> Reviewed-by:
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Michal Koutný authored
The keys in smaps output are padded to fixed width with spaces. All except for THPeligible that uses tabs (only since commit c0630669 ("mm: thp: fix false negative of shmem vma's THP eligibility")). Unify the output formatting to save time debugging some naïve parsers. (Part of the unification is also aligning FilePmdMapped with others.) Signed-off-by:
Michal Koutný <mkoutny@suse.com> Signed-off-by:
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Joonsoo Kim authored
Now that workingset detection is implemented for anonymous LRU, we don't need large inactive list to allow detecting frequently accessed pages before they are reclaimed, anymore. This effectively reverts the temporary measure put in by commit "mm/vmscan: make active/inactive ratio as 1:1 for anon lru". Signed-off-by:
Joonsoo Kim <iamjoonsoo.kim@lge.com> Signed-off-by:
Johannes Weiner <hannes@cmpxchg.org> Acked-by:
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Joonsoo Kim authored
This patch implements workingset detection for anonymous LRU. All the infrastructure is implemented by the previous patches so this patch just activates the workingset detection by installing/retrieving the shadow entry and adding refault calculation. Signed-off-by:
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Joonsoo Kim authored
Workingset detection for anonymous page will be implemented in the following patch and it requires to store the shadow entries into the swapcache. This patch implements an infrastructure to store the shadow entry in the swapcache. Signed-off-by:
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Joonsoo Kim authored
To prepare the workingset detection for anon LRU, this patch splits workingset event counters for refault, activate and restore into anon and file variants, as well as the refaults counter in struct lruvec. Signed-off-by:
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Joonsoo Kim authored
In current implementation, newly created or swap-in anonymous page is started on active list. Growing active list results in rebalancing active/inactive list so old pages on active list are demoted to inactive list. Hence, the page on active list isn't protected at all. Following is an example of this situation. Assume that 50 hot pages on active list. Numbers denote the number of pages on active/inactive list (active | inactive). 1. 50 hot pages on active list 50(h) | 0 2. workload: 50 newly created (used-once) pages 50(uo) | 50(h) 3. workload: another 50 newly created (used-once) pages 50(uo) | 50(uo), swap-out 50(h) This patch tries to fix this issue. Like as file LRU, newly created or swap-in anonymous pages will be inserted to the inactive list. They are promoted to active list if enough reference happens. This simple modification changes the above example as following. 1. 50 hot pages on active list 50(h) | 0 2. workload: 50 newly created (used-once) pages 50(h) | 50(uo) 3. workload: another 50 newly created (used-once) pages 50(h) | 50(uo), swap-out 50(uo) As you can see, hot pages on active list would be protected. Note that, this implementation has a drawback that the page cannot be promoted and will be swapped-out if re-access interval is greater than the size of inactive list but less than the size of total(active+inactive). To solve this potential issue, following patch will apply workingset detection similar to the one that's already applied to file LRU. Signed-off-by:
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Joonsoo Kim authored
Patch series "workingset protection/detection on the anonymous LRU list", v7. * PROBLEM In current implementation, newly created or swap-in anonymous page is started on the active list. Growing the active list results in rebalancing active/inactive list so old pages on the active list are demoted to the inactive list. Hence, hot page on the active list isn't protected at all. Following is an example of this situation. Assume that 50 hot pages on active list and system can contain total 100 pages. Numbers denote the number of pages on active/inactive list (active | inactive). (h) stands for hot pages and (uo) stands for used-once pages. 1. 50 hot pages on active list 50(h) | 0 2. workload: 50 newly created (used-once) pages 50(uo) | 50(h) 3. workload: another 50 newly created (used-once) pages 50(uo) | 50(uo), swap-out 50(h) As we can see, hot pages are swapped-out and it would cause swap-in later. * SOLUTION Since this is what we want to avoid, this patchset implements workingset protection. Like as the file LRU list, newly created or swap-in anonymous page is started on the inactive list. Also, like as the file LRU list, if enough reference happens, the page will be promoted. This simple modification changes the above example as following. 1. 50 hot pages on active list 50(h) | 0 2. workload: 50 newly created (used-once) pages 50(h) | 50(uo) 3. workload: another 50 newly created (used-once) pages 50(h) | 50(uo), swap-out 50(uo) hot pages remains in the active list. :) * EXPERIMENT I tested this scenario on my test bed and confirmed that this problem happens on current implementation. I also checked that it is fixed by this patchset. * SUBJECT workingset detection * PROBLEM Later part of the patchset implements the workingset detection for the anonymous LRU list. There is a corner case that workingset protection could cause thrashing. If we can avoid thrashing by workingset detection, we can get the better performance. Following is an example of thrashing due to the workingset protection. 1. 50 hot pages on active list 50(h) | 0 2. workload: 50 newly created (will be hot) pages 50(h) | 50(wh) 3. workload: another 50 newly created (used-once) pages 50(h) | 50(uo), swap-out 50(wh) 4. workload: 50 (will be hot) pages 50(h) | 50(wh), swap-in 50(wh) 5. workload: another 50 newly created (used-once) pages 50(h) | 50(uo), swap-out 50(wh) 6. repeat 4, 5 Without workingset detection, this kind of workload cannot be promoted and thrashing happens forever. * SOLUTION Therefore, this patchset implements workingset detection. All the infrastructure for workingset detecion is already implemented, so there is not much work to do. First, extend workingset detection code to deal with the anonymous LRU list. Then, make swap cache handles the exceptional value for the shadow entry. Lastly, install/retrieve the shadow value into/from the swap cache and check the refault distance. * EXPERIMENT I made a test program to imitates above scenario and confirmed that problem exists. Then, I checked that this patchset fixes it. My test setup is a virtual machine with 8 cpus and 6100MB memory. But, the amount of the memory that the test program can use is about 280 MB. This is because the system uses large ram-backed swap and large ramdisk to capture the trace. Test scenario is like as below. 1. allocate cold memory (512MB) 2. allocate hot-1 memory (96MB) 3. activate hot-1 memory (96MB) 4. allocate another hot-2 memory (96MB) 5. access cold memory (128MB) 6. access hot-2 memory (96MB) 7. repeat 5, 6 Since hot-1 memory (96MB) is on the active list, the inactive list can contains roughly 190MB pages. hot-2 memory's re-access interval (96+128 MB) is more 190MB, so it cannot be promoted without workingset detection and swap-in/out happens repeatedly. With this patchset, workingset detection works and promotion happens. Therefore, swap-in/out occurs less. Here is the result. (average of 5 runs) type swap-in swap-out base 863240 989945 patch 681565 809273 As we can see, patched kernel do less swap-in/out. * OVERALL TEST (ebizzy using modified random function) ebizzy is the test program that main thread allocates lots of memory and child threads access them randomly during the given times. Swap-in will happen if allocated memory is larger than the system memory. The random function that represents the zipf distribution is used to make hot/cold memory. Hot/cold ratio is controlled by the parameter. If the parameter is high, hot memory is accessed much larger than cold one. If the parameter is low, the number of access on each memory would be similar. I uses various parameters in order to show the effect of patchset on various hot/cold ratio workload. My test setup is a virtual machine with 8 cpus, 1024 MB memory and 5120 MB ram swap. Result format is as following. param: 1-1024-0.1 - 1 (number of thread) - 1024 (allocated memory size, MB) - 0.1 (zipf distribution alpha, 0.1 works like as roughly uniform random, 1.3 works like as small portion of memory is hot and the others are cold) pswpin: smaller is better std: standard deviation improvement: negative is better * single thread param pswpin std improvement base 1-1024.0-0.1 14101983.40 79441.19 prot 1-1024.0-0.1 14065875.80 136413.01 ( -0.26 ) detect 1-1024.0-0.1 13910435.60 100804.82 ( -1.36 ) base 1-1024.0-0.7 7998368.80 43469.32 prot 1-1024.0-0.7 7622245.80 88318.74 ( -4.70 ) detect 1-1024.0-0.7 7618515.20 59742.07 ( -4.75 ) base 1-1024.0-1.3 1017400.80 38756.30 prot 1-1024.0-1.3 940464.60 29310.69 ( -7.56 ) detect 1-1024.0-1.3 945511.40 24579.52 ( -7.07 ) base 1-1280.0-0.1 22895541.40 50016.08 prot 1-1280.0-0.1 22860305.40 51952.37 ( -0.15 ) detect 1-1280.0-0.1 22705565.20 93380.35 ( -0.83 ) base 1-1280.0-0.7 13717645.60 46250.65 prot 1-1280.0-0.7 12935355.80 64754.43 ( -5.70 ) detect 1-1280.0-0.7 13040232.00 63304.00 ( -4.94 ) base 1-1280.0-1.3 1654251.40 4159.68 prot 1-1280.0-1.3 1522680.60 33673.50 ( -7.95 ) detect 1-1280.0-1.3 1599207.00 70327.89 ( -3.33 ) base 1-1536.0-0.1 31621775.40 31156.28 prot 1-1536.0-0.1 31540355.20 62241.36 ( -0.26 ) detect 1-1536.0-0.1 31420056.00 123831.27 ( -0.64 ) base 1-1536.0-0.7 19620760.60 60937.60 prot 1-1536.0-0.7 18337839.60 56102.58 ( -6.54 ) detect 1-1536.0-0.7 18599128.00 75289.48 ( -5.21 ) base 1-1536.0-1.3 2378142.40 20994.43 prot 1-1536.0-1.3 2166260.60 48455.46 ( -8.91 ) detect 1-1536.0-1.3 2183762.20 16883.24 ( -8.17 ) base 1-1792.0-0.1 40259714.80 90750.70 prot 1-1792.0-0.1 40053917.20 64509.47 ( -0.51 ) detect 1-1792.0-0.1 39949736.40 104989.64 ( -0.77 ) base 1-1792.0-0.7 25704884.40 69429.68 prot 1-1792.0-0.7 23937389.00 79945.60 ( -6.88 ) detect 1-1792.0-0.7 24271902.00 35044.30 ( -5.57 ) base 1-1792.0-1.3 3129497.00 32731.86 prot 1-1792.0-1.3 2796994.40 19017.26 ( -10.62 ) detect 1-1792.0-1.3 2886840.40 33938.82 ( -7.75 ) base 1-2048.0-0.1 48746924.40 50863.88 prot 1-2048.0-0.1 48631954.40 24537.30 ( -0.24 ) detect 1-2048.0-0.1 48509419.80 27085.34 ( -0.49 ) base 1-2048.0-0.7 32046424.40 78624.22 prot 1-2048.0-0.7 29764182.20 86002.26 ( -7.12 ) detect 1-2048.0-0.7 30250315.80 101282.14 ( -5.60 ) base 1-2048.0-1.3 3916723.60 24048.55 prot 1-2048.0-1.3 3490781.60 33292.61 ( -10.87 ) detect 1-2048.0-1.3 3585002.20 44942.04 ( -8.47 ) * multi thread param pswpin std improvement base 8-1024.0-0.1 16219822.60 329474.01 prot 8-1024.0-0.1 15959494.00 654597.45 ( -1.61 ) detect 8-1024.0-0.1 15773790.80 502275.25 ( -2.75 ) base 8-1024.0-0.7 9174107.80 537619.33 prot 8-1024.0-0.7 8571915.00 385230.08 ( -6.56 ) detect 8-1024.0-0.7 8489484.20 364683.00 ( -7.46 ) base 8-1024.0-1.3 1108495.60 83555.98 prot 8-1024.0-1.3 1038906.20 63465.20 ( -6.28 ) detect 8-1024.0-1.3 941817.80 32648.80 ( -15.04 ) base 8-1280.0-0.1 25776114.20 450480.45 prot 8-1280.0-0.1 25430847.00 465627.07 ( -1.34 ) detect 8-1280.0-0.1 25282555.00 465666.55 ( -1.91 ) base 8-1280.0-0.7 15218968.00 702007.69 prot 8-1280.0-0.7 13957947.80 492643.86 ( -8.29 ) detect 8-1280.0-0.7 14158331.20 238656.02 ( -6.97 ) base 8-1280.0-1.3 1792482.80 30512.90 prot 8-1280.0-1.3 1577686.40 34002.62 ( -11.98 ) detect 8-1280.0-1.3 1556133.00 22944.79 ( -13.19 ) base 8-1536.0-0.1 33923761.40 575455.85 prot 8-1536.0-0.1 32715766.20 300633.51 ( -3.56 ) detect 8-1536.0-0.1 33158477.40 117764.51 ( -2.26 ) base 8-1536.0-0.7 20628907.80 303851.34 prot 8-1536.0-0.7 19329511.20 341719.31 ( -6.30 ) detect 8-1536.0-0.7 20013934.00 385358.66 ( -2.98 ) base 8-1536.0-1.3 2588106.40 130769.20 prot 8-1536.0-1.3 2275222.40 89637.06 ( -12.09 ) detect 8-1536.0-1.3 2365008.40 124412.55 ( -8.62 ) base 8-1792.0-0.1 43328279.20 946469.12 prot 8-1792.0-0.1 41481980.80 525690.89 ( -4.26 ) detect 8-1792.0-0.1 41713944.60 406798.93 ( -3.73 ) base 8-1792.0-0.7 27155647.40 536253.57 prot 8-1792.0-0.7 24989406.80 502734.52 ( -7.98 ) detect 8-1792.0-0.7 25524806.40 263237.87 ( -6.01 ) base 8-1792.0-1.3 3260372.80 137907.92 prot 8-1792.0-1.3 2879187.80 63597.26 ( -11.69 ) detect 8-1792.0-1.3 2892962.20 33229.13 ( -11.27 ) base 8-2048.0-0.1 50583989.80 710121.48 prot 8-2048.0-0.1 49599984.40 228782.42 ( -1.95 ) detect 8-2048.0-0.1 50578596.00 660971.66 ( -0.01 ) base 8-2048.0-0.7 33765479.60 812659.55 prot 8-2048.0-0.7 30767021.20 462907.24 ( -8.88 ) detect 8-2048.0-0.7 32213068.80 211884.24 ( -4.60 ) base 8-2048.0-1.3 3941675.80 28436.45 prot 8-2048.0-1.3 3538742.40 76856.08 ( -10.22 ) detect 8-2048.0-1.3 3579397.80 58630.95 ( -9.19 ) As we can see, all the cases show improvement. Especially, test case with zipf distribution 1.3 show more improvements. It means that if there is a hot/cold tendency in anon pages, this patchset works better. This patch (of 6): Current implementation of LRU management for anonymous page has some problems. Most important one is that it doesn't protect the workingset, that is, pages on the active LRU list. Although, this problem will be fixed in the following patchset, the preparation is required and this patch does it. What following patch does is to implement workingset protection. After the following patchset, newly created or swap-in pages will start their lifetime on the inactive list. If inactive list is too small, there is not enough chance to be referenced and the page cannot become the workingset. In order to provide the newly anonymous or swap-in pages enough chance to be referenced again, this patch makes active/inactive LRU ratio as 1:1. This is just a temporary measure. Later patch in the series introduces workingset detection for anonymous LRU that will be used to better decide if pages should start on the active and inactive list. Afterwards this patch is effectively reverted. Signed-off-by: -
Muchun Song authored
In the reservation routine, we only check whether the cpuset meets the memory allocation requirements. But we ignore the mempolicy of MPOL_BIND case. If someone mmap hugetlb succeeds, but the subsequent memory allocation may fail due to mempolicy restrictions and receives the SIGBUS signal. This can be reproduced by the follow steps. 1) Compile the test case. cd tools/testing/selftests/vm/ gcc map_hugetlb.c -o map_hugetlb 2) Pre-allocate huge pages. Suppose there are 2 numa nodes in the system. Each node will pre-allocate one huge page. echo 2 > /proc/sys/vm/nr_hugepages 3) Run test case(mmap 4MB). We receive the SIGBUS signal. numactl --membind=3D0 ./map_hugetlb 4 With this patch applied, the mmap will fail in the step 3) and throw "mmap: Cannot allocate memory". [akpm@linux-foundation.org: include sched.h for `current'] Reported-by:Jianchao Guo <guojianchao@bytedance.com> Suggested-by:
Michal Hocko <mhocko@kernel.org> Signed-off-by:
Muchun Song <songmuchun@bytedance.com> Signed-off-by:
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Roman Gushchin authored
Add a simple test to check the percpu memory accounting. The test creates a cgroup tree with 1000 child cgroups and checks values of memory.current and memory.stat::percpu. Signed-off-by:
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Roman Gushchin authored
Memory cgroups are using large chunks of percpu memory to store vmstat data. Yet this memory is not accounted at all, so in the case when there are many (dying) cgroups, it's not exactly clear where all the memory is. Because the size of memory cgroup internal structures can dramatically exceed the size of object or page which is pinning it in the memory, it's not a good idea to simply ignore it. It actually breaks the isolation between cgroups. Let's account the consumed percpu memory to the parent cgroup. [guro@fb.com: add WARN_ON_ONCE()s, per Johannes] Link: http://lkml.kernel.org/r/20200811170611.GB1507044@carbon.DHCP.thefacebook.comSigned-off-by:
Shakeel Butt <shakeelb@google.com> Acked-by:
Dennis Zhou <dennis@kernel.org> Acked-by:
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Roman Gushchin authored
Percpu memory can represent a noticeable chunk of the total memory consumption, especially on big machines with many CPUs. Let's track percpu memory usage for each memcg and display it in memory.stat. A percpu allocation is usually scattered over multiple pages (and nodes), and can be significantly smaller than a page. So let's add a byte-sized counter on the memcg level: MEMCG_PERCPU_B. Byte-sized vmstat infra created for slabs can be perfectly reused for percpu case. [guro@fb.com: v3] Link: http://lkml.kernel.org/r/20200623184515.4132564-4-guro@fb.comSigned-off-by:
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Roman Gushchin authored
Percpu memory is becoming more and more widely used by various subsystems, and the total amount of memory controlled by the percpu allocator can make a good part of the total memory. As an example, bpf maps can consume a lot of percpu memory, and they are created by a user. Also, some cgroup internals (e.g. memory controller statistics) can be quite large. On a machine with many CPUs and big number of cgroups they can consume hundreds of megabytes. So the lack of memcg accounting is creating a breach in the memory isolation. Similar to the slab memory, percpu memory should be accounted by default. To implement the perpcu accounting it's possible to take the slab memory accounting as a model to follow. Let's introduce two types of percpu chunks: root and memcg. What makes memcg chunks different is an additional space allocated to store memcg membership information. If __GFP_ACCOUNT is passed on allocation, a memcg chunk should be be used. If it's possible to charge the corresponding size to the target memory cgroup, allocation is performed, and the memcg ownership data is recorded. System-wide allocations are performed using root chunks, so there is no additional memory overhead. To implement a fast reparenting of percpu memory on memcg removal, we don't store mem_cgroup pointers directly: instead we use obj_cgroup API, introduced for slab accounting. [akpm@linux-foundation.org: fix CONFIG_MEMCG_KMEM=n build errors and warning] [akpm@linux-foundation.org: move unreachable code, per Roman] [cuibixuan@huawei.com: mm/percpu: fix 'defined but not used' warning] Link: http://lkml.kernel.org/r/6d41b939-a741-b521-a7a2-e7296ec16219@huawei.comSigned-off-by:
Bixuan Cui <cuibixuan@huawei.com> Signed-off-by:
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Roman Gushchin authored
Patch series "mm: memcg accounting of percpu memory", v3. This patchset adds percpu memory accounting to memory cgroups. It's based on the rework of the slab controller and reuses concepts and features introduced for the per-object slab accounting. Percpu memory is becoming more and more widely used by various subsystems, and the total amount of memory controlled by the percpu allocator can make a good part of the total memory. As an example, bpf maps can consume a lot of percpu memory, and they are created by a user. Also, some cgroup internals (e.g. memory controller statistics) can be quite large. On a machine with many CPUs and big number of cgroups they can consume hundreds of megabytes. So the lack of memcg accounting is creating a breach in the memory isolation. Similar to the slab memory, percpu memory should be accounted by default. Percpu allocations by their nature are scattered over multiple pages, so they can't be tracked on the per-page basis. So the per-object tracking introduced by the new slab controller is reused. The patchset implements charging of percpu allocations, adds memcg-level statistics, enables accounting for percpu allocations made by memory cgroup internals and provides some basic tests. To implement the accounting of percpu memory without a significant memory and performance overhead the following approach is used: all accounted allocations are placed into a separate percpu chunk (or chunks). These chunks are similar to default chunks, except that they do have an attached vector of pointers to obj_cgroup objects, which is big enough to save a pointer for each allocated object. On the allocation, if the allocation has to be accounted (__GFP_ACCOUNT is passed, the allocating process belongs to a non-root memory cgroup, etc), the memory cgroup is getting charged and if the maximum limit is not exceeded the allocation is performed using a memcg-aware chunk. Otherwise -ENOMEM is returned or the allocation is forced over the limit, depending on gfp (as any other kernel memory allocation). The memory cgroup information is saved in the obj_cgroup vector at the corresponding offset. On the release time the memcg information is restored from the vector and the cgroup is getting uncharged. Unaccounted allocations (at this point the absolute majority of all percpu allocations) are performed in the old way, so no additional overhead is expected. To avoid pinning dying memory cgroups by outstanding allocations, obj_cgroup API is used instead of directly saving memory cgroup pointers. obj_cgroup is basically a pointer to a memory cgroup with a standalone reference counter. The trick is that it can be atomically swapped to point at the parent cgroup, so that the original memory cgroup can be released prior to all objects, which has been charged to it. Because all charges and statistics are fully recursive, it's perfectly correct to uncharge the parent cgroup instead. This scheme is used in the slab memory accounting, and percpu memory can just follow the scheme. This patch (of 5): To implement accounting of percpu memory we need the information about the size of freed object. Return it from pcpu_free_area(). Signed-off-by:
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- 11 Aug, 2020 6 commits
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git://git.kernel.org/pub/scm/linux/kernel/git/acme/linuxLinus Torvalds authored
Pull perf tools updates from Arnaldo Carvalho de Melo: "New features: - Introduce controlling how 'perf stat' and 'perf record' works via a control file descriptor, allowing starting with events configured but disabled until commands are received via the control file descriptor. This allows, for instance for tools such as Intel VTune to make further use of perf as its Linux platform driver. - Improve 'perf record' to to register in a perf.data file header the clockid used to help later correlate things like syslog files and perf events recorded. - Add basic syscall and find_next_bit benchmarks to 'perf bench'. - Allow using computed metrics in calculating other metrics. For instance: { .metric_expr = "l2_rqsts.demand_data_rd_hit + l2_rqsts.pf_hit + l2_rqsts.rfo_hit", .metric_name = "DCache_L2_All_Hits", }, { .metric_expr = "max(l2_rqsts.all_demand_data_rd - l2_rqsts.demand_data_rd_hit, 0) + l2_rqsts.pf_miss + l2_rqsts.rfo_miss", .metric_name = "DCache_L2_All_Miss", }, { .metric_expr = "dcache_l2_all_hits + dcache_l2_all_miss", .metric_name = "DCache_L2_All", } - Add suport for 'd_ratio', '>' and '<' operators to the expression resolver used in calculating metrics in 'perf stat'. Support for new kernel features: - Support TEXT_POKE and KSYMBOL_TYPE_OOL perf metadata events to cope with things like ftrace, trampolines, i.e. changes in the kernel text that gets in the way of properly decoding Intel PT hardware traces, for instance. Intel PT: - Add various knobs to reduce the volume of Intel PT traces by reducing the level of details such as decoding just some types of packets (e.g., FUP/TIP, PSB+), also filtering by time range. - Add new itrace options (log flags to the 'd' option, error flags to the 'e' one, etc), controlling how Intel PT is transformed into perf events, document some missing options (e.g., how to synthesize callchains). BPF: - Properly report BPF errors when parsing events. - Do not setup side-band events if LIBBPF is not linked, fixing a segfault. Libraries: - Improvements to the libtraceevent plugin mechanism. - Improve libtracevent support for KVM trace events SVM exit reasons. - Add a libtracevent plugins for decoding syscalls/sys_enter_futex and for tlb_flush. - Ensure sample_period is set libpfm4 events in 'perf test'. - Fixup libperf namespacing, to make sure what is in libperf has the perf_ namespace while what is now only in tools/perf/ doesn't use that prefix. Arch specific: - Improve the testing of vendor events and metrics in 'perf test'. - Allow no ARM CoreSight hardware tracer sink to be specified on command line. - Fix arm_spe_x recording when mixed with other perf events. - Add s390 idle functions 'psw_idle' and 'psw_idle_exit' to list of idle symbols. - List kernel supplied event aliases for arm64 in 'perf list'. - Add support for extended register capability in PowerPC 9 and 10. - Added nest IMC power9 metric events. Miscellaneous: - No need to setup sample_regs_intr/sample_regs_user for dummy events. - Update various copies of kernel headers, some causing perf to handle new syscalls, MSRs, etc. - Improve usage of flex and yacc, enabling warnings and addressing the fallout. - Add missing '--output' option to 'perf kmem' so that it can pass it along to 'perf record'. - 'perf probe' fixes related to adding multiple probes on the same address for the same event. - Make 'perf probe' warn if the target function is a GNU indirect function. - Remove //anon mmap events from 'perf inject jit' to fix supporting both using ELF files for generated functions and the perf-PID.map approaches" * tag 'perf-tools-2020-08-10' of git://git.kernel.org/pub/scm/linux/kernel/git/acme/linux: (144 commits) perf record: Skip side-band event setup if HAVE_LIBBPF_SUPPORT is not set perf tools powerpc: Add support for extended regs in power10 perf tools powerpc: Add support for extended register capability tools headers UAPI: Sync drm/i915_drm.h with the kernel sources tools arch x86: Sync asm/cpufeatures.h with the kernel sources tools arch x86: Sync the msr-index.h copy with the kernel sources tools headers UAPI: update linux/in.h copy tools headers API: Update close_range affected files perf script: Add 'tod' field to display time of day perf script: Change the 'enum perf_output_field' enumerators to be 64 bits perf data: Add support to store time of day in CTF data conversion perf tools: Move clockid_res_ns under clock struct perf header: Store clock references for -k/--clockid option perf tools: Add clockid_name function perf clockid: Move parse_clockid() to new clockid object tools lib traceevent: Handle possible strdup() error in tep_add_plugin_path() API libtraceevent: Fixed description of tep_add_plugin_path() API libtraceevent: Fixed type in PRINT_FMT_STING libtraceevent: Fixed broken indentation in parse_ip4_print_args() libtraceevent: Improve error handling of tep_plugin_add_option() API ... -
git://git.kernel.org/pub/scm/linux/kernel/git/rostedt/linux-ktestLinus Torvalds authored
Pull ktest updates from Steven Rostedt: - Have config-bisect save the good/bad configs at each step. - Show log file location even on success - Add PRE_TEST_DIE to kill test if the PRE_TEST fails - Add a NOT operator for conditionals in config file - Add the log output of the last test when emailing on failure. - Other minor clean ups and small fixes. * tag 'ktest-v5.9' of git://git.kernel.org/pub/scm/linux/kernel/git/rostedt/linux-ktest: ktest.pl: Fix spelling mistake "Cant" -> "Can't" ktest.pl: Change the logic to control the size of the log file emailed ktest.pl: Add MAIL_MAX_SIZE to limit the amount of log emailed ktest.pl: Add the log of last test in email on failure ktest.pl: Turn off buffering to the log file ktest.pl: Just open up the log file once ktest.pl: Add a NOT operator ktest.pl: Define PRE_TEST_DIE to kill the test if the PRE_TEST fails ktest.pl: Always show log file location if defined even on success ktest.pl: Have config-bisect save each config used in the bisect
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git://git.kernel.org/pub/scm/linux/kernel/git/tip/tipLinus Torvalds authored
Pull locking updates from Thomas Gleixner: "A set of locking fixes and updates: - Untangle the header spaghetti which causes build failures in various situations caused by the lockdep additions to seqcount to validate that the write side critical sections are non-preemptible. - The seqcount associated lock debug addons which were blocked by the above fallout. seqcount writers contrary to seqlock writers must be externally serialized, which usually happens via locking - except for strict per CPU seqcounts. As the lock is not part of the seqcount, lockdep cannot validate that the lock is held. This new debug mechanism adds the concept of associated locks. sequence count has now lock type variants and corresponding initializers which take a pointer to the associated lock used for writer serialization. If lockdep is enabled the pointer is stored and write_seqcount_begin() has a lockdep assertion to validate that the lock is held. Aside of the type and the initializer no other code changes are required at the seqcount usage sites. The rest of the seqcount API is unchanged and determines the type at compile time with the help of _Generic which is possible now that the minimal GCC version has been moved up. Adding this lockdep coverage unearthed a handful of seqcount bugs which have been addressed already independent of this. While generally useful this comes with a Trojan Horse twist: On RT kernels the write side critical section can become preemtible if the writers are serialized by an associated lock, which leads to the well known reader preempts writer livelock. RT prevents this by storing the associated lock pointer independent of lockdep in the seqcount and changing the reader side to block on the lock when a reader detects that a writer is in the write side critical section. - Conversion of seqcount usage sites to associated types and initializers" * tag 'locking-urgent-2020-08-10' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip: (25 commits) locking/seqlock, headers: Untangle the spaghetti monster locking, arch/ia64: Reduce <asm/smp.h> header dependencies by moving XTP bits into the new <asm/xtp.h> header x86/headers: Remove APIC headers from <asm/smp.h> seqcount: More consistent seqprop names seqcount: Compress SEQCNT_LOCKNAME_ZERO() seqlock: Fold seqcount_LOCKNAME_init() definition seqlock: Fold seqcount_LOCKNAME_t definition seqlock: s/__SEQ_LOCKDEP/__SEQ_LOCK/g hrtimer: Use sequence counter with associated raw spinlock kvm/eventfd: Use sequence counter with associated spinlock userfaultfd: Use sequence counter with associated spinlock NFSv4: Use sequence counter with associated spinlock iocost: Use sequence counter with associated spinlock raid5: Use sequence counter with associated spinlock vfs: Use sequence counter with associated spinlock timekeeping: Use sequence counter with associated raw spinlock xfrm: policy: Use sequence counters with associated lock netfilter: nft_set_rbtree: Use sequence counter with associated rwlock netfilter: conntrack: Use sequence counter with associated spinlock sched: tasks: Use sequence counter with associated spinlock ... -
git://git.kernel.org/pub/scm/linux/kernel/git/jaegeuk/f2fsLinus Torvalds authored
Pull f2fs updates from Jaegeuk Kim: "In this round, we've added two small interfaces: (a) GC_URGENT_LOW mode for performance and (b) F2FS_IOC_SEC_TRIM_FILE ioctl for security. The new GC mode allows Android to run some lower priority GCs in background, while new ioctl discards user information without race condition when the account is removed. In addition, some patches were merged to address latency-related issues. We've fixed some compression-related bug fixes as well as edge race conditions. Enhancements: - add GC_URGENT_LOW mode in gc_urgent - introduce F2FS_IOC_SEC_TRIM_FILE ioctl - bypass racy readahead to improve read latencies - shrink node_write lock coverage to avoid long latency Bug fixes: - fix missing compression flag control, i_size, and mount option - fix deadlock between quota writes and checkpoint - remove inode eviction path in synchronous path to avoid deadlock - fix to wait GCed compressed page writeback - fix a kernel panic in f2fs_is_compressed_page - check page dirty status before writeback - wait page writeback before update in node page write flow - fix a race condition between f2fs_write_end_io and f2fs_del_fsync_node_entry We've added some minor sanity checks and refactored trivial code blocks for better readability and debugging information" * tag 'f2fs-for-5.9-rc1' of git://git.kernel.org/pub/scm/linux/kernel/git/jaegeuk/f2fs: (52 commits) f2fs: prepare a waiter before entering io_schedule f2fs: update_sit_entry: Make the judgment condition of f2fs_bug_on more intuitive f2fs: replace test_and_set/clear_bit() with set/clear_bit() f2fs: make file immutable even if releasing zero compression block f2fs: compress: disable compression mount option if compression is off f2fs: compress: add sanity check during compressed cluster read f2fs: use macro instead of f2fs verity version f2fs: fix deadlock between quota writes and checkpoint f2fs: correct comment of f2fs_exist_written_data f2fs: compress: delay temp page allocation f2fs: compress: fix to update isize when overwriting compressed file f2fs: space related cleanup f2fs: fix use-after-free issue f2fs: Change the type of f2fs_flush_inline_data() to void f2fs: add F2FS_IOC_SEC_TRIM_FILE ioctl f2fs: should avoid inode eviction in synchronous path f2fs: segment.h: delete a duplicated word f2fs: compress: fix to avoid memory leak on cc->cpages f2fs: use generic names for generic ioctls f2fs: don't keep meta inode pages used for compressed block migration ...
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git://git.kernel.org/pub/scm/linux/kernel/git/gfs2/linux-gfs2Linus Torvalds authored
Pull gfs2 updates from Andreas Gruenbacher: - Make sure transactions won't be started recursively in gfs2_block_zero_range (bug introduced in 5.4 when switching to iomap_zero_range) - Fix a glock holder refcount leak introduced in the iopen glock locking scheme rework merged in 5.8. - A few other small improvements (debugging, stack usage, comment fixes). * tag 'gfs2-for-5.9' of git://git.kernel.org/pub/scm/linux/kernel/git/gfs2/linux-gfs2: gfs2: When gfs2_dirty_inode gets a glock error, dump the glock gfs2: Never call gfs2_block_zero_range with an open transaction gfs2: print details on transactions that aren't properly ended gfs2: Fix inaccurate comment fs: Fix typo in comment gfs2: Fix refcount leak in gfs2_glock_poke gfs2: Pass glock holder to gfs2_file_direct_{read,write} gfs2: Add some flags missing from glock output
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git://git.kernel.org/pub/scm/linux/kernel/git/rw/ubifsLinus Torvalds authored
Pull JFFS2, UBI and UBIFS updates from Richard Weinberger: "JFFS2: - Fix for a corner case while mounting - Fix for an use-after-free issue UBI: - Fix for a memory load while attaching - Don't produce an anchor PEB with fastmap being disabled UBIFS: - Fix for orphan inode logic - Spelling fixes - New mount option to specify filesystem version" * tag 'for-linus-5.9-rc1' of git://git.kernel.org/pub/scm/linux/kernel/git/rw/ubifs: jffs2: fix UAF problem jffs2: fix jffs2 mounting failure ubifs: Fix wrong orphan node deletion in ubifs_jnl_update|rename ubi: fastmap: Free fastmap next anchor peb during detach ubi: fastmap: Don't produce the initial next anchor PEB when fastmap is disabled ubifs: misc.h: delete a duplicated word ubifs: add option to specify version for new file systems
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