- 07 Aug, 2014 40 commits
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Sergey Senozhatsky authored
Cleanup unused `if 0'-ed functions, which have been dead since 2006 (commits 87c2ce3b ("lib/zlib*: cleanups") by Adrian Bunk and 4f3865fb ("zlib_inflate: Upgrade library code to a recent version") by Richard Purdie): - zlib_deflateSetDictionary - zlib_deflateParams - zlib_deflateCopy - zlib_inflateSync - zlib_syncsearch - zlib_inflateSetDictionary - zlib_inflatePrime Signed-off-by:
Sergey Senozhatsky <sergey.senozhatsky@gmail.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Ken Helias authored
The name was modified from hlist_add_after() to hlist_add_behind() when adjusting the order of arguments to match the one with klist_add_after(). This is necessary to break old code when it would use it the wrong way. Make klist follow this naming scheme for consistency. Signed-off-by:
Ken Helias <kenhelias@firemail.de> Cc: "Paul E. McKenney" <paulmck@linux.vnet.ibm.com> Cc: Christoph Hellwig <hch@infradead.org> Cc: Hugh Dickins <hughd@google.com> Cc: Jeff Kirsher <jeffrey.t.kirsher@intel.com> Signed-off-by:
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Ken Helias authored
All other add functions for lists have the new item as first argument and the position where it is added as second argument. This was changed for no good reason in this function and makes using it unnecessary confusing. The name was changed to hlist_add_behind() to cause unconverted code to generate a compile error instead of using the wrong parameter order. [akpm@linux-foundation.org: coding-style fixes] Signed-off-by:
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Ken Helias authored
The argument names for hlist_add_after() are poorly chosen because they look the same as the ones for hlist_add_before() but have to be used differently. hlist_add_after_rcu() has made a better choice. Signed-off-by:
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Neil Zhang authored
Fix coccinelle warnings. Signed-off-by:
Neil Zhang <zhangwm@marvell.com> Signed-off-by:
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Jan Kara authored
We need interrupts disabled when calling console_trylock_for_printk() only so that cpu id we pass to can_use_console() remains valid (for other things console_sem provides all the exclusion we need and deadlocks on console_sem due to interrupts are impossible because we use down_trylock()). However if we are rescheduled, we are guaranteed to run on an online cpu so we can easily just get the cpu id in can_use_console(). We can lose a bit of performance when we enable interrupts in vprintk_emit() and then disable them again in console_unlock() but OTOH it can somewhat reduce interrupt latency caused by console_unlock(). We differ from (reverted) commit 939f04be in that we avoid calling console_unlock() from vprintk_emit() with lockdep enabled as that has unveiled quite some bugs leading to system freezes during boot (e.g. https://lkml.org/lkml/2014/5/30/242, https://lkml.org/lkml/2014/6/28/521). Signed-off-by:
Jan Kara <jack@suse.cz> Tested-by:
Andreas Bombe <aeb@debian.org> Signed-off-by:
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Alex Elder authored
Some small cleanups to kernel/printk/printk.c. None of them should cause any change in behavior. - When CONFIG_PRINTK is defined, parenthesize the value of LOG_LINE_MAX. - When CONFIG_PRINTK is *not* defined, there is an extra LOG_LINE_MAX definition; delete it. - Pull an assignment out of a conditional expression in console_setup(). - Use isdigit() in console_setup() rather than open coding it. - In update_console_cmdline(), drop a NUL-termination assignment; the strlcpy() call that precedes it guarantees it's not needed. - Simplify some logic in printk_timed_ratelimit(). Signed-off-by:Alex Elder <elder@linaro.org> Reviewed-by:
Petr Mladek <pmladek@suse.cz> Cc: Andi Kleen <ak@linux.intel.com> Cc: Borislav Petkov <bp@suse.de> Cc: Jan Kara <jack@suse.cz> Cc: John Stultz <john.stultz@linaro.org> Cc: Steven Rostedt <rostedt@goodmis.org> Signed-off-by:
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Alex Elder authored
Use the IS_ENABLED() macro rather than #ifdef blocks to set certain global values. Signed-off-by:
Borislav Petkov <bp@suse.de> Reviewed-by:
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Alex Elder authored
Fix a few comments that don't accurately describe their corresponding code. It also fixes some minor typographical errors. Signed-off-by:
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Alex Elder authored
Commit a8fe19eb ("kernel/printk: use symbolic defines for console loglevels") makes consistent use of symbolic values for printk() log levels. The naming scheme used is different from the one used for DEFAULT_MESSAGE_LOGLEVEL though. Change that symbol name to be MESSAGE_LOGLEVEL_DEFAULT for consistency. And because the value of that symbol comes from a similarly-named config option, rename CONFIG_DEFAULT_MESSAGE_LOGLEVEL as well. Signed-off-by:
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Alex Elder authored
In do_syslog() there's a path used by kmsg_poll() and kmsg_read() that only needs to know whether there's any data available to read (and not its size). These callers only check for non-zero return. As a shortcut, do_syslog() returns the difference between what has been logged and what has been "seen." The comments say that the "count of records" should be returned but it's not. Instead it returns (log_next_idx - syslog_idx), which is a difference between buffer offsets--and the result could be negative. The behavior is the same (it'll be zero or not in the same cases), but the count of records is more meaningful and it matches what the comments say. So change the code to return that. Signed-off-by:
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Luis R. Rodriguez authored
The default size of the ring buffer is too small for machines with a large amount of CPUs under heavy load. What ends up happening when debugging is the ring buffer overlaps and chews up old messages making debugging impossible unless the size is passed as a kernel parameter. An idle system upon boot up will on average spew out only about one or two extra lines but where this really matters is on heavy load and that will vary widely depending on the system and environment. There are mechanisms to help increase the kernel ring buffer for tracing through debugfs, and those interfaces even allow growing the kernel ring buffer per CPU. We also have a static value which can be passed upon boot. Relying on debugfs however is not ideal for production, and relying on the value passed upon bootup is can only used *after* an issue has creeped up. Instead of being reactive this adds a proactive measure which lets you scale the amount of contributions you'd expect to the kernel ring buffer under load by each CPU in the worst case scenario. We use num_possible_cpus() to avoid complexities which could be introduced by dynamically changing the ring buffer size at run time, num_possible_cpus() lets us use the upper limit on possible number of CPUs therefore avoiding having to deal with hotplugging CPUs on and off. This introduces the kernel configuration option LOG_CPU_MAX_BUF_SHIFT which is used to specify the maximum amount of contributions to the kernel ring buffer in the worst case before the kernel ring buffer flips over, the size is specified as a power of 2. The total amount of contributions made by each CPU must be greater than half of the default kernel ring buffer size (1 << LOG_BUF_SHIFT bytes) in order to trigger an increase upon bootup. The kernel ring buffer is increased to the next power of two that would fit the required minimum kernel ring buffer size plus the additional CPU contribution. For example if LOG_BUF_SHIFT is 18 (256 KB) you'd require at least 128 KB contributions by other CPUs in order to trigger an increase of the kernel ring buffer. With a LOG_CPU_BUF_SHIFT of 12 (4 KB) you'd require at least anything over > 64 possible CPUs to trigger an increase. If you had 128 possible CPUs the amount of minimum required kernel ring buffer bumps to: ((1 << 18) + ((128 - 1) * (1 << 12))) / 1024 = 764 KB Since we require the ring buffer to be a power of two the new required size would be 1024 KB. This CPU contributions are ignored when the "log_buf_len" kernel parameter is used as it forces the exact size of the ring buffer to an expected power of two value. [pmladek@suse.cz: fix build] Signed-off-by:
Luis R. Rodriguez <mcgrof@suse.com> Signed-off-by:
Davidlohr Bueso <davidlohr@hp.com> Tested-by:
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Luis R. Rodriguez authored
Signed-off-by:
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Luis R. Rodriguez authored
In practice the power of 2 practice of the size of the kernel ring buffer remains purely historical but not a requirement, specially now that we have LOG_ALIGN and use it for both static and dynamic allocations. It could have helped with implicit alignment back in the days given the even the dynamically sized ring buffer was guaranteed to be aligned so long as CONFIG_LOG_BUF_SHIFT was set to produce a __LOG_BUF_LEN which is architecture aligned, since log_buf_len=n would be allowed only if it was > __LOG_BUF_LEN and we always ended up rounding the log_buf_len=n to the next power of 2 with roundup_pow_of_two(), any multiple of 2 then should be also architecture aligned. These assumptions of course relied heavily on CONFIG_LOG_BUF_SHIFT producing an aligned value but users can always change this. We now have precise alignment requirements set for the log buffer size for both static and dynamic allocations, but lets upkeep the old practice of using powers of 2 for its size to help with easy expected scalable values and the allocators for dynamic allocations. We'll reuse this later so move this into a helper. Signed-off-by:
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Luis R. Rodriguez authored
We have to consider alignment for the ring buffer both for the default static size, and then also for when an dynamic allocation is made when the log_buf_len=n kernel parameter is passed to set the size specifically to a size larger than the default size set by the architecture through CONFIG_LOG_BUF_SHIFT. The default static kernel ring buffer can be aligned properly if architectures set CONFIG_LOG_BUF_SHIFT properly, we provide ranges for the size though so even if CONFIG_LOG_BUF_SHIFT has a sensible aligned value it can be reduced to a non aligned value. Commit 6ebb017d ("printk: Fix alignment of buf causing crash on ARM EABI") by Andrew Lunn ensures the static buffer is always aligned and the decision of alignment is done by the compiler by using __alignof__(struct log). When log_buf_len=n is used we allocate the ring buffer dynamically. Dynamic allocation varies, for the early allocation called before setup_arch() memblock_virt_alloc() requests a page aligment and for the default kernel allocation memblock_virt_alloc_nopanic() requests no special alignment, which in turn ends up aligning the allocation to SMP_CACHE_BYTES, which is L1 cache aligned. Since we already have the required alignment for the kernel ring buffer though we can do better and request explicit alignment for LOG_ALIGN. This does that to be safe and make dynamic allocation alignment explicit. Signed-off-by:
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Geoff Levand authored
Signed-off-by:
Geoff Levand <geoff@infradead.org> Signed-off-by:
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Joe Perches authored
The DEFINE_SIMPLE_ATTRIBUTE macro should not end in a ; Fix the one use in the kernel tree that did not have a semicolon. Signed-off-by:
Joe Perches <joe@perches.com> Acked-by:
Guenter Roeck <linux@roeck-us.net> Acked-by:
Luca Tettamanti <kronos.it@gmail.com> Signed-off-by:
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Jiri Kosina authored
We have been chasing a memory corruption bug, which turned out to be caused by very old gcc (4.3.4), which happily turned conditional load into a non-conditional one, and that broke correctness (the condition was met only if lock was held) and corrupted memory. This particular problem with that particular code did not happen when never gccs were used. I've brought this up with our gcc folks, as I wanted to make sure that this can't really happen again, and it turns out it actually can. Quoting Martin Jambor <mjambor@suse.cz>: "More current GCCs are more careful when it comes to replacing a conditional load with a non-conditional one, most notably they check that a store happens in each iteration of _a_ loop but they assume loops are executed. They also perform a simple check whether the store cannot trap which currently passes only for non-const variables. A simple testcase demonstrating it on an x86_64 is for example the following: $ cat cond_store.c int g_1 = 1; int g_2[1024] __attribute__((section ("safe_section"), aligned (4096))); int c = 4; int __attribute__ ((noinline)) foo (void) { int l; for (l = 0; (l != 4); l++) { if (g_1) return l; for (g_2[0] = 0; (g_2[0] >= 26); ++g_2[0]) ; } return 2; } int main (int argc, char* argv[]) { if (mprotect (g_2, sizeof(g_2), PROT_READ) == -1) { int e = errno; error (e, e, "mprotect error %i", e); } foo (); __builtin_printf("OK\n"); return 0; } /* EOF */ $ ~/gcc/trunk/inst/bin/gcc cond_store.c -O2 --param allow-store-data-races=0 $ ./a.out OK $ ~/gcc/trunk/inst/bin/gcc cond_store.c -O2 --param allow-store-data-races=1 $ ./a.out Segmentation fault The testcase fails the same at least with 4.9, 4.8 and 4.7. Therefore I would suggest building kernels with this parameter set to zero. I also agree with Jikos that the default should be changed for -O2. I have run most of the SPEC 2k6 CPU benchmarks (gamess and dealII failed, at -O2, not sure why) compiled with and without this option and did not see any real difference between respective run-times" Hopefully the default will be changed in newer gccs, but let's force it for kernel builds so that we are on a safe side even when older gcc are used. The code in question was out-of-tree printk-in-NMI (yeah, surprise suprise, once again) patch written by Petr Mladek, let me quote his comment from our internal bugzilla: "I have spent few days investigating inconsistent state of kernel ring buffer. It went out that it was caused by speculative store generated by gcc-4.3.4. The problem is in assembly generated for make_free_space(). The functions is called the following way: + vprintk_emit(); + log = MAIN_LOG; // with logbuf_lock or log = NMI_LOG; // with nmi_logbuf_lock cont_add(log, ...); + cont_flush(log, ...); + log_store(log, ...); + log_make_free_space(log, ...); If called with log = NMI_LOG then only nmi_log_* global variables are safe to modify but the generated code does store also into (main_)log_* global variables: <log_make_free_space>: 55 push %rbp 89 f6 mov %esi,%esi 48 8b 05 03 99 51 01 mov 0x1519903(%rip),%rax # ffffffff82620868 <nmi_log_next_id> 44 8b 1d ec 98 51 01 mov 0x15198ec(%rip),%r11d # ffffffff82620858 <log_next_idx> 8b 35 36 60 14 01 mov 0x1146036(%rip),%esi # ffffffff8224cfa8 <log_buf_len> 44 8b 35 33 60 14 01 mov 0x1146033(%rip),%r14d # ffffffff8224cfac <nmi_log_buf_len> 4c 8b 2d d0 98 51 01 mov 0x15198d0(%rip),%r13 # ffffffff82620850 <log_next_seq> 4c 8b 25 11 61 14 01 mov 0x1146111(%rip),%r12 # ffffffff8224d098 <log_buf> 49 89 c2 mov %rax,%r10 48 21 c2 and %rax,%rdx 48 8b 1d 0c 99 55 01 mov 0x155990c(%rip),%rbx # ffffffff826608a0 <nmi_log_buf> 49 c1 ea 20 shr $0x20,%r10 48 89 55 d0 mov %rdx,-0x30(%rbp) 44 29 de sub %r11d,%esi 45 29 d6 sub %r10d,%r14d 4c 8b 0d 97 98 51 01 mov 0x1519897(%rip),%r9 # ffffffff82620840 <log_first_seq> eb 7e jmp ffffffff81107029 <log_make_free_space+0xe9> [...] 85 ff test %edi,%edi # edi = 1 for NMI_LOG 4c 89 e8 mov %r13,%rax 4c 89 ca mov %r9,%rdx 74 0a je ffffffff8110703d <log_make_free_space+0xfd> 8b 15 27 98 51 01 mov 0x1519827(%rip),%edx # ffffffff82620860 <nmi_log_first_id> 48 8b 45 d0 mov -0x30(%rbp),%rax 48 39 c2 cmp %rax,%rdx # end of loop 0f 84 da 00 00 00 je ffffffff81107120 <log_make_free_space+0x1e0> [...] 85 ff test %edi,%edi # edi = 1 for NMI_LOG 4c 89 0d 17 97 51 01 mov %r9,0x1519717(%rip) # ffffffff82620840 <log_first_seq> ^^^^^^^^^^^^^^^^^^^^^^^^^^ KABOOOM 74 35 je ffffffff81107160 <log_make_free_space+0x220> It stores log_first_seq when edi == NMI_LOG. This instructions are used also when edi == MAIN_LOG but the store is done speculatively before the condition is decided. It is unsafe because we do not have "logbuf_lock" in NMI context and some other process migh modify "log_first_seq" in parallel" I believe that the best course of action is both - building kernel (and anything multi-threaded, I guess) with that optimization turned off - persuade gcc folks to change the default for future releases Signed-off-by:Jiri Kosina <jkosina@suse.cz> Cc: Martin Jambor <mjambor@suse.cz> Cc: Petr Mladek <pmladek@suse.cz> Cc: Linus Torvalds <torvalds@linux-foundation.org> Cc: Paul E. McKenney <paulmck@linux.vnet.ibm.com> Cc: Peter Zijlstra <peterz@infradead.org> Cc: Marek Polacek <polacek@redhat.com> Cc: Jakub Jelinek <jakub@redhat.com> Cc: Steven Noonan <steven@uplinklabs.net> Cc: Richard Biener <richard.guenther@gmail.com> Cc: Dan Carpenter <dan.carpenter@oracle.com> Signed-off-by:
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Dan Streetman authored
Change zswap to use the zpool api instead of directly using zbud. Add a boot-time param to allow selecting which zpool implementation to use, with zbud as the default. Signed-off-by:
Dan Streetman <ddstreet@ieee.org> Tested-by:
Seth Jennings <sjennings@variantweb.net> Cc: Weijie Yang <weijie.yang@samsung.com> Cc: Minchan Kim <minchan@kernel.org> Cc: Nitin Gupta <ngupta@vflare.org> Signed-off-by:
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Dan Streetman authored
Update zbud and zsmalloc to implement the zpool api. [fengguang.wu@intel.com: make functions static] Signed-off-by:
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Dan Streetman authored
Add zpool api. zpool provides an interface for memory storage, typically of compressed memory. Users can select what backend to use; currently the only implementations are zbud, a low density implementation with up to two compressed pages per storage page, and zsmalloc, a higher density implementation with multiple compressed pages per storage page. Signed-off-by:
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Dan Streetman authored
Change the type of the zbud_alloc() size param from unsigned int to size_t. Technically, this should not make any difference, as the zbud implementation already restricts the size to well within either type's limits; but as zsmalloc (and kmalloc) use size_t, and zpool will use size_t, this brings the size parameter type in line with zsmalloc/zpool. Signed-off-by:
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Weijie Yang authored
Currently, we use a rwlock tb_lock to protect concurrent access to the whole zram meta table. However, according to the actual access model, there is only a small chance for upper user to access the same table[index], so the current lock granularity is too big. The idea of optimization is to change the lock granularity from whole meta table to per table entry (table -> table[index]), so that we can protect concurrent access to the same table[index], meanwhile allow the maximum concurrency. With this in mind, several kinds of locks which could be used as a per-entry lock were tested and compared: Test environment: x86-64 Intel Core2 Q8400, system memory 4GB, Ubuntu 12.04, kernel v3.15.0-rc3 as base, zram with 4 max_comp_streams LZO. iozone test: iozone -t 4 -R -r 16K -s 200M -I +Z (1GB zram with ext4 filesystem, take the average of 10 tests, KB/s) Test base CAS spinlock rwlock bit_spinlock ------------------------------------------------------------------- Initial write 1381094 1425435 1422860 1423075 1421521 Rewrite 1529479 1641199 1668762 1672855 1654910 Read 8468009 11324979 11305569 11117273 10997202 Re-read 8467476 11260914 11248059 11145336 10906486 Reverse Read 6821393 8106334 8282174 8279195 8109186 Stride read 7191093 8994306 9153982 8961224 9004434 Random read 7156353 8957932 9167098 8980465 8940476 Mixed workload 4172747 5680814 5927825 5489578 5972253 Random write 1483044 1605588 1594329 1600453 1596010 Pwrite 1276644 1303108 1311612 1314228 1300960 Pread 4324337 4632869 4618386 4457870 4500166 To enhance the possibility of access the same table[index] concurrently, set zram a small disksize(10MB) and let threads run with large loop count. fio test: fio --bs=32k --randrepeat=1 --randseed=100 --refill_buffers --scramble_buffers=1 --direct=1 --loops=3000 --numjobs=4 --filename=/dev/zram0 --name=seq-write --rw=write --stonewall --name=seq-read --rw=read --stonewall --name=seq-readwrite --rw=rw --stonewall --name=rand-readwrite --rw=randrw --stonewall (10MB zram raw block device, take the average of 10 tests, KB/s) Test base CAS spinlock rwlock bit_spinlock ------------------------------------------------------------- seq-write 933789 999357 1003298 995961 1001958 seq-read 5634130 6577930 6380861 6243912 6230006 seq-rw 1405687 1638117 1640256 1633903 1634459 rand-rw 1386119 1614664 1617211 1609267 1612471 All the optimization methods show a higher performance than the base, however, it is hard to say which method is the most appropriate. On the other hand, zram is mostly used on small embedded system, so we don't want to increase any memory footprint. This patch pick the bit_spinlock method, pack object size and page_flag into an unsigned long table.value, so as to not increase any memory overhead on both 32-bit and 64-bit system. On the third hand, even though different kinds of locks have different performances, we can ignore this difference, because: if zram is used as zram swapfile, the swap subsystem can prevent concurrent access to the same swapslot; if zram is used as zram-blk for set up filesystem on it, the upper filesystem and the page cache also prevent concurrent access of the same block mostly. So we can ignore the different performances among locks. Acked-by:Weijie Yang <weijie.yang@samsung.com> Signed-off-by:
Minchan Kim <minchan@kernel.org> Cc: Jerome Marchand <jmarchan@redhat.com> Cc: Nitin Gupta <ngupta@vflare.org> Signed-off-by:
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Minchan Kim authored
Some architectures (eg, hexagon and PowerPC) could use PAGE_SHIFT of 16 or more. In these cases u16 is not sufficiently large to represent a compressed page's size so use size_t. Signed-off-by:
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Sergey Senozhatsky authored
Drop SECTOR_SIZE define, because it's not used. Signed-off-by:
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Sergey Senozhatsky authored
Andrew Morton has recently noted that `struct table' actually represents table entry and, thus, should be renamed. Rename to `zram_table_entry'. Signed-off-by:
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Max Filippov authored
User-visible effect: Architectures that choose this method of maintaining cache coherency (MIPS and xtensa currently) are able to use high memory on cores with aliasing data cache. Without this fix such architectures can not use high memory (in case of xtensa it means that at most 128 MBytes of physical memory is available). The problem: VIPT cache with way size larger than MMU page size may suffer from aliasing problem: a single physical address accessed via different virtual addresses may end up in multiple locations in the cache. Virtual mappings of a physical address that always get cached in different cache locations are said to have different colors. L1 caching hardware usually doesn't handle this situation leaving it up to software. Software must avoid this situation as it leads to data corruption. What can be done: One way to handle this is to flush and invalidate data cache every time page mapping changes color. The other way is to always map physical page at a virtual address with the same color. Low memory pages already have this property. Giving architecture a way to control color of high memory page mapping allows reusing of existing low memory cache alias handling code. How this is done with this patch: Provide hooks that allow architectures with aliasing cache to align mapping address of high pages according to their color. Such architectures may enforce similar coloring of low- and high-memory page mappings and reuse existing cache management functions to support highmem. This code is based on the implementation of similar feature for MIPS by Leonid Yegoshin. Signed-off-by:
Max Filippov <jcmvbkbc@gmail.com> Cc: Leonid Yegoshin <Leonid.Yegoshin@imgtec.com> Cc: Chris Zankel <chris@zankel.net> Cc: Marc Gauthier <marc@cadence.com> Cc: David Rientjes <rientjes@google.com> Cc: Steven Hill <Steven.Hill@imgtec.com> Signed-off-by:
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Peter Zijlstra authored
When kernel device drivers or subsystems want to bind their lifespan to t= he lifespan of the mm_struct, they usually use one of the following methods: 1. Manually calling a function in the interested kernel module. The funct= ion call needs to be placed in mmput. This method was rejected by several ker= nel maintainers. 2. Registering to the mmu notifier release mechanism. The problem with the latter approach is that the mmu_notifier_release cal= lback is called from__mmu_notifier_release (called from exit_mmap). That functi= on iterates over the list of mmu notifiers and don't expect the release call= back function to remove itself from the list. Therefore, the callback function= in the kernel module can't release the mmu_notifier_object, which is actuall= y the kernel module's object itself. As a result, the destruction of the kernel module's object must to be done in a delayed fashion. This patch adds support for this delayed callback, by adding a new mmu_notifier_call_srcu function that receives a function ptr and calls th= at function with call_srcu. In that function, the kernel module releases its object. To use mmu_notifier_call_srcu, the calling module needs to call b= efore that a new function called mmu_notifier_unregister_no_release that as its= name implies, unregisters a notifier without calling its notifier release call= back. This patch also adds a function that will call barrier_srcu so those kern= el modules can sync with mmu_notifier. Signed-off-by:
Peter Zijlstra <peterz@infradead.org> Signed-off-by:
Jérôme Glisse <jglisse@redhat.com> Signed-off-by:
Oded Gabbay <oded.gabbay@amd.com> Signed-off-by:
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Chintan Pandya authored
__kmap_atomic_idx is per_cpu variable. Each CPU can use KM_TYPE_NR entries from FIXMAP i.e. from 0 to KM_TYPE_NR - 1. Allowing __kmap_atomic_idx to over- shoot to KM_TYPE_NR can mess up with next CPU's 0th entry which is a bug. Hence BUG_ON if __kmap_atomic_idx >= KM_TYPE_NR. Fix the off-by-on in this test. Signed-off-by:
Chintan Pandya <cpandya@codeaurora.org> Cc: David Rientjes <rientjes@google.com> Signed-off-by:
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Johannes Weiner authored
Charge reclaim and OOM currently use the charge batch variable, but batching is already disabled at that point. To simplify the charge logic, the batch variable is reset to the original request size when reclaim is entered, so it's functionally equal, but it's misleading. Switch reclaim/OOM to nr_pages, which is the original request size. Signed-off-by:
Johannes Weiner <hannes@cmpxchg.org> Cc: Michal Hocko <mhocko@suse.cz> Signed-off-by:
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Sasha Levin authored
The rarely-executed memry-allocation-failed callback path generates a WARN_ON_ONCE() when smp_call_function_single() succeeds. Presumably it's supposed to warn on failures. Signed-off-by:
Sasha Levin <sasha.levin@oracle.com> Cc: Christoph Lameter <cl@gentwo.org> Cc: Gilad Ben-Yossef <gilad@benyossef.com> Cc: David Rientjes <rientjes@google.com> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Cc: Tejun Heo <htejun@gmail.com> Cc: <stable@vger.kernel.org> Signed-off-by:
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Rik van Riel authored
This patch changes confusing #ifdef use in __access_remote_vm into merely ugly #ifdef use. Addresses bug https://bugzilla.kernel.org/show_bug.cgi?id=81651Signed-off-by:
Rik van Riel <riel@redhat.com> Reported-by:
David Binderman <dcb314@hotmail.com> Signed-off-by:
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Peter Feiner authored
After a VMA is created with the VM_SOFTDIRTY flag set, /proc/pid/pagemap should report that the VMA's virtual pages are soft-dirty until VM_SOFTDIRTY is cleared (i.e., by the next write of "4" to /proc/pid/clear_refs). However, pagemap ignores the VM_SOFTDIRTY flag for virtual addresses that fall in PTE holes (i.e., virtual addresses that don't have a PMD, PUD, or PGD allocated yet). To observe this bug, use mmap to create a VMA large enough such that there's a good chance that the VMA will occupy an unused PMD, then test the soft-dirty bit on its pages. In practice, I found that a VMA that covered a PMD's worth of address space was big enough. This patch adds the necessary VMA lookup to the PTE hole callback in /proc/pid/pagemap's page walk and sets soft-dirty according to the VMAs' VM_SOFTDIRTY flag. Signed-off-by:
Peter Feiner <pfeiner@google.com> Acked-by:
Cyrill Gorcunov <gorcunov@openvz.org> Cc: Pavel Emelyanov <xemul@parallels.com> Cc: Hugh Dickins <hughd@google.com> Acked-by:
Naoya Horiguchi <n-horiguchi@ah.jp.nec.com> Signed-off-by:
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Kirill A. Shutemov authored
fault_around_bytes can only be changed via debugfs. Let's mark it read-mostly. Signed-off-by:
Kirill A. Shutemov <kirill.shutemov@linux.intel.com> Suggested-by:
David Rientjes <rientjes@google.com> Acked-by:
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Kirill A. Shutemov authored
Things can go wrong if fault_around_bytes will be changed under do_fault_around(): between fault_around_mask() and fault_around_pages(). Let's read fault_around_bytes only once during do_fault_around() and calculate mask based on the reading. Note: fault_around_bytes can only be updated via debug interface. Also I've tried but was not able to trigger a bad behaviour without the patch. So I would not consider this patch as urgent. Signed-off-by:
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Jerome Marchand authored
When memory cgoups are enabled, the code that decides to force to scan anonymous pages in get_scan_count() compares global values (free, high_watermark) to a value that is restricted to a memory cgroup (file). It make the code over-eager to force anon scan. For instance, it will force anon scan when scanning a memcg that is mainly populated by anonymous page, even when there is plenty of file pages to get rid of in others memcgs, even when swappiness == 0. It breaks user's expectation about swappiness and hurts performance. This patch makes sure that forced anon scan only happens when there not enough file pages for the all zone, not just in one random memcg. [hannes@cmpxchg.org: cleanups] Signed-off-by:
Jerome Marchand <jmarchan@redhat.com> Acked-by:
Michal Hocko <mhocko@suse.cz> Acked-by:
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Jerome Marchand authored
Quite a while ago, get_scan_ratio() has been renamed get_scan_count(), however a comment in shrink_active_list() still mention it. This patch fixes the outdated comment. Signed-off-by:
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David Rientjes authored
The oom killer scans each process and determines whether it is eligible for oom kill or whether the oom killer should abort because of concurrent memory freeing. It will abort when an eligible process is found to have TIF_MEMDIE set, meaning it has already been oom killed and we're waiting for it to exit. Processes with task->mm == NULL should not be considered because they are either kthreads or have already detached their memory and killing them would not lead to memory freeing. That memory is only freed after exit_mm() has returned, however, and not when task->mm is first set to NULL. Clear TIF_MEMDIE after exit_mm()'s mmput() so that an oom killed process is no longer considered for oom kill, but only until exit_mm() has returned. This was fragile in the past because it relied on exit_notify() to be reached before no longer considering TIF_MEMDIE processes. Signed-off-by:
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Li Zhong authored
It is possible for some platforms, such as powerpc to set HPAGE_SHIFT to 0 to indicate huge pages not supported. When this is the case, hugetlbfs could be disabled during boot time: hugetlbfs: disabling because there are no supported hugepage sizes Then in dissolve_free_huge_pages(), order is kept maximum (64 for 64bits), and the for loop below won't end: for (pfn = start_pfn; pfn < end_pfn; pfn += 1 << order) As suggested by Naoya, below fix checks hugepages_supported() before calling dissolve_free_huge_pages(). [rientjes@google.com: no legitimate reason to call dissolve_free_huge_pages() when !hugepages_supported()] Signed-off-by:
Li Zhong <zhong@linux.vnet.ibm.com> Acked-by:
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David Rientjes authored
__GFP_NO_KSWAPD, once the way to determine if an allocation was for thp or not, has gained more users. Their use is not necessarily wrong, they are trying to do a memory allocation that can easily fail without disturbing kswapd, so the bit has gained additional usecases. This restructures the check to determine whether MIGRATE_SYNC_LIGHT should be used for memory compaction in the page allocator. Rather than testing solely for __GFP_NO_KSWAPD, test for all bits that must be set for thp allocations. This also moves the check to be done only after the page allocator is aborted for deferred or contended memory compaction since setting migration_mode for this case is pointless. Signed-off-by:
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