- Oct 09, 2012
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Michel Lespinasse authored
Implement an interval tree as a replacement for the VMA prio_tree. The algorithms are similar to lib/interval_tree.c; however that code can't be directly reused as the interval endpoints are not explicitly stored in the VMA. So instead, the common algorithm is moved into a template and the details (node type, how to get interval endpoints from the node, etc) are filled in using the C preprocessor. Once the interval tree functions are available, using them as a replacement to the VMA prio tree is a relatively simple, mechanical job. Signed-off-by:
Michel Lespinasse <walken@google.com> Cc: Rik van Riel <riel@redhat.com> Cc: Hillf Danton <dhillf@gmail.com> Cc: Peter Zijlstra <a.p.zijlstra@chello.nl> Cc: Catalin Marinas <catalin.marinas@arm.com> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: David Woodhouse <dwmw2@infradead.org> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Michel Lespinasse authored
Patch 1 implements support for interval trees, on top of the augmented rbtree API. It also adds synthetic tests to compare the performance of interval trees vs prio trees. Short answers is that interval trees are slightly faster (~25%) on insert/erase, and much faster (~2.4 - 3x) on search. It is debatable how realistic the synthetic test is, and I have not made such measurements yet, but my impression is that interval trees would still come out faster. Patch 2 uses a preprocessor template to make the interval tree generic, and uses it as a replacement for the vma prio_tree. Patch 3 takes the other prio_tree user, kmemleak, and converts it to use a basic rbtree. We don't actually need the augmented rbtree support here because the intervals are always non-overlapping. Patch 4 removes the now-unused prio tree library. Patch 5 proposes an additional optimization to rb_erase_augmented, now providing it as an inline function so that the augmented callbacks can be inlined in. This provides an additional 5-10% performance improvement for the interval tree insert/erase benchmark. There is a maintainance cost as it exposes augmented rbtree users to some of the rbtree library internals; however I think this cost shouldn't be too high as I expect the augmented rbtree will always have much less users than the base rbtree. I should probably add a quick summary of why I think it makes sense to replace prio trees with augmented rbtree based interval trees now. One of the drivers is that we need augmented rbtrees for Rik's vma gap finding code, and once you have them, it just makes sense to use them for interval trees as well, as this is the simpler and more well known algorithm. prio trees, in comparison, seem *too* clever: they impose an additional 'heap' constraint on the tree, which they use to guarantee a faster worst-case complexity of O(k+log N) for stabbing queries in a well-balanced prio tree, vs O(k*log N) for interval trees (where k=number of matches, N=number of intervals). Now this sounds great, but in practice prio trees don't realize this theorical benefit. First, the additional constraint makes them harder to update, so that the kernel implementation has to simplify things by balancing them like a radix tree, which is not always ideal. Second, the fact that there are both index and heap properties makes both tree manipulation and search more complex, which results in a higher multiplicative time constant. As it turns out, the simple interval tree algorithm ends up running faster than the more clever prio tree. This patch: Add two test modules: - prio_tree_test measures the performance of lib/prio_tree.c, both for insertion/removal and for stabbing searches - interval_tree_test measures the performance of a library of equivalent functionality, built using the augmented rbtree support. In order to support the second test module, lib/interval_tree.c is introduced. It is kept separate from the interval_tree_test main file for two reasons: first we don't want to provide an unfair advantage over prio_tree_test by having everything in a single compilation unit, and second there is the possibility that the interval tree functionality could get some non-test users in kernel over time. Signed-off-by:
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Michel Lespinasse authored
As proposed by Peter Zijlstra, this makes it easier to define the augmented rbtree callbacks. Signed-off-by:
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Michel Lespinasse authored
convert arch/x86/mm/pat_rbtree.c to the proposed augmented rbtree api and remove the old augmented rbtree implementation. Signed-off-by:
Rik van Riel <riel@redhat.com> Cc: Peter Zijlstra <a.p.zijlstra@chello.nl> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: David Woodhouse <dwmw2@infradead.org> Signed-off-by:
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Michel Lespinasse authored
Introduce new augmented rbtree APIs that allow minimal recalculation of augmented node information. A new callback is added to the rbtree insertion and erase rebalancing functions, to be called on each tree rotations. Such rotations preserve the subtree's root augmented value, but require recalculation of the one child that was previously located at the subtree root. In the insertion case, the handcoded search phase must be updated to maintain the augmented information on insertion, and then the rbtree coloring/rebalancing algorithms keep it up to date. In the erase case, things are more complicated since it is library code that manipulates the rbtree in order to remove internal nodes. This requires a couple additional callbacks to copy a subtree's augmented value when a new root is stitched in, and to recompute augmented values down the ancestry path when a node is removed from the tree. In order to preserve maximum speed for the non-augmented case, we provide two versions of each tree manipulation function. rb_insert_augmented() is the augmented equivalent of rb_insert_color(), and rb_erase_augmented() is the augmented equivalent of rb_erase(). Signed-off-by:
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Michel Lespinasse authored
Small test to measure the performance of augmented rbtrees. Signed-off-by:
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Michel Lespinasse authored
Various minor optimizations in rb_erase(): - Avoid multiple loading of node->__rb_parent_color when computing parent and color information (possibly not in close sequence, as there might be further branches in the algorithm) - In the 1-child subcase of case 1, copy the __rb_parent_color field from the erased node to the child instead of recomputing it from the desired parent and color - When searching for the erased node's successor, differentiate between cases 2 and 3 based on whether any left links were followed. This avoids a condition later down. - In case 3, keep a pointer to the erased node's right child so we don't have to refetch it later to adjust its parent. - In the no-childs subcase of cases 2 and 3, place the rebalance assigment last so that the compiler can remove the following if(rebalance) test. Also, added some comments to illustrate cases 2 and 3. Signed-off-by:
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Michel Lespinasse authored
An interesting observation for rb_erase() is that when a node has exactly one child, the node must be black and the child must be red. An interesting consequence is that removing such a node can be done by simply replacing it with its child and making the child black, which we can do efficiently in rb_erase(). __rb_erase_color() then only needs to handle the no-childs case and can be modified accordingly. Signed-off-by:
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Michel Lespinasse authored
In rb_erase, move the easy case (node to erase has no more than 1 child) first. I feel the code reads easier that way. Signed-off-by:
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Michel Lespinasse authored
Add __rb_change_child() as an inline helper function to replace code that would otherwise be duplicated 4 times in the source. No changes to binary size or speed. Signed-off-by:
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Michel Lespinasse authored
Just a small fix to make sparse happy. Signed-off-by:
Fengguang Wu <wfg@linux.intel.com> Acked-by:
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Michel Lespinasse authored
When looking to fetch a node's sibling, we went through a sequence of: - check if node is the parent's left child - if it is, then fetch the parent's right child This can be replaced with: - fetch the parent's right child as an assumed sibling - check that node is NOT the fetched child This avoids fetching the parent's left child when node is actually that child. Saves a bit on code size, though it doesn't seem to make a large difference in speed. Signed-off-by:
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Michel Lespinasse authored
Set comment and indentation style to be consistent with linux coding style and the rest of the file, as suggested by Peter Zijlstra Signed-off-by:
David Woodhouse <David.Woodhouse@intel.com> Cc: Rik van Riel <riel@redhat.com> Cc: Peter Zijlstra <a.p.zijlstra@chello.nl> Cc: Daniel Santos <daniel.santos@pobox.com> Cc: Jens Axboe <axboe@kernel.dk> Cc: "Eric W. Biederman" <ebiederm@xmission.com> Signed-off-by:
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Michel Lespinasse authored
In __rb_erase_color(), we often already have pointers to the nodes being rotated and/or know what their colors must be, so we can generate more efficient code than the generic __rb_rotate_left() and __rb_rotate_right() functions. Also when the current node is red or when flipping the sibling's color, the parent is already known so we can use the more efficient rb_set_parent_color() function to set the desired color. Signed-off-by:
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Michel Lespinasse authored
In __rb_erase_color(), we have to select one of 3 cases depending on the color on the 'other' node children. If both children are black, we flip a few node colors and iterate. Otherwise, we do either one or two tree rotations, depending on the color of the 'other' child opposite to 'node', and then we are done. The corresponding logic had duplicate checks for the color of the 'other' child opposite to 'node'. It was checking it first to determine if both children are black, and then to determine how many tree rotations are required. Rearrange the logic to avoid that extra check. Signed-off-by:
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Michel Lespinasse authored
In __rb_erase_color(), we were always setting a node to black after exiting the main loop. And in one case, after fixing up the tree to satisfy all rbtree invariants, we were setting the current node to root just to guarantee a loop exit, at which point the root would be set to black. However this is not necessary, as the root of an rbtree is already known to be black. The only case where the color flip is required is when we exit the loop due to the current node being red, and it's easiest to just do the flip at that point instead of doing it after the loop. [adrian.hunter@intel.com: perf tools: fix build for another rbtree.c change] Signed-off-by:
Adrian Hunter <adrian.hunter@intel.com> Cc: Alexander Shishkin <alexander.shishkin@intel.com> Signed-off-by:
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Michel Lespinasse authored
- Use the newly introduced rb_set_parent_color() function to flip the color of nodes whose parent is already known. - Optimize rb_parent() when the node is known to be red - there is no need to mask out the color in that case. - Flipping gparent's color to red requires us to fetch its rb_parent_color field, so we can reuse it as the parent value for the next loop iteration. - Do not use __rb_rotate_left() and __rb_rotate_right() to handle tree rotations: we already have pointers to all relevant nodes, and know their colors (either because we want to adjust it, or because we've tested it, or we can deduce it as black due to the node proximity to a known red node). So we can generate more efficient code by making use of the node pointers we already have, and setting both the parent and color attributes for nodes all at once. Also in Case 2, some node attributes don't have to be set because we know another tree rotation (Case 3) will always follow and override them. Signed-off-by:
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Michel Lespinasse authored
The root node of an rbtree must always be black. However, rb_insert_color() only needs to maintain this invariant when it has been broken - that is, when it exits the loop due to the current (red) node being the root. In all other cases (exiting after tree rotations, or exiting due to an existing black parent) the invariant is already satisfied, so there is no need to adjust the root node color. Signed-off-by:
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Michel Lespinasse authored
It is a well known property of rbtrees that insertion never requires more than two tree rotations. In our implementation, after one loop iteration identified one or two necessary tree rotations, we would iterate and look for more. However at that point the node's parent would always be black, which would cause us to exit the loop. We can make the code flow more obvious by just adding a break statement after the tree rotations, where we know we are done. Additionally, in the cases where two tree rotations are necessary, we don't have to update the 'node' pointer as it wouldn't be used until the next loop iteration, which we now avoid due to this break statement. Signed-off-by:
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Michel Lespinasse authored
This small module helps measure the performance of rbtree insert and erase. Additionally, we run a few correctness tests to check that the rbtrees have all desired properties: - contains the right number of nodes in the order desired, - never two consecutive red nodes on any path, - all paths to leaf nodes have the same number of black nodes, - root node is black [akpm@linux-foundation.org: fix printk warning: sparc64 cycles_t is unsigned long] Signed-off-by:
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Michel Lespinasse authored
rbtree users must use the documented APIs to manipulate the tree structure. Low-level helpers to manipulate node colors and parenthood are not part of that API, so move them to lib/rbtree.c [dwmw2@infradead.org: fix jffs2 build issue due to renamed __rb_parent_color field] Signed-off-by:
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Michel Lespinasse authored
Empty nodes have no color. We can make use of this property to simplify the code emitted by the RB_EMPTY_NODE and RB_CLEAR_NODE macros. Also, we can get rid of the rb_init_node function which had been introduced by commit 88d19cf3 ("timers: Add rb_init_node() to allow for stack allocated rb nodes") to avoid some issue with the empty node's color not being initialized. I'm not sure what the RB_EMPTY_NODE checks in rb_prev() / rb_next() are doing there, though. axboe introduced them in commit 10fd48f2 ("rbtree: fixed reversed RB_EMPTY_NODE and rb_next/prev"). The way I see it, the 'empty node' abstraction is only used by rbtree users to flag nodes that they haven't inserted in any rbtree, so asking the predecessor or successor of such nodes doesn't make any sense. One final rb_init_node() caller was recently added in sysctl code to implement faster sysctl name lookups. This code doesn't make use of RB_EMPTY_NODE at all, and from what I could see it only called rb_init_node() under the mistaken assumption that such initialization was required before node insertion. [sfr@canb.auug.org.au: fix net/ceph/osd_client.c build] Signed-off-by:
Stephen Rothwell <sfr@canb.auug.org.au> Signed-off-by:
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Catalin Marinas authored
Introduce HAVE_DEBUG_BUGVERBOSE config option and select it in corresponding architecture Kconfig files. Architectures that already select GENERIC_BUG don't need to select HAVE_DEBUG_BUGVERBOSE. Signed-off-by:
Catalin Marinas <catalin.marinas@arm.com> Acked-by:
Geert Uytterhoeven <geert@linux-m68k.org> Cc: David Howells <dhowells@redhat.com> Cc: Hirokazu Takata <takata@linux-m32r.org> Cc: Paul Mundt <lethal@linux-sh.org> Cc: "David S. Miller" <davem@davemloft.net> Cc: Chris Metcalf <cmetcalf@tilera.com> Signed-off-by:
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Catalin Marinas authored
Introduce HAVE_DEBUG_KMEMLEAK config option and select it in corresponding architecture Kconfig files. DEBUG_KMEMLEAK now only depends on HAVE_DEBUG_KMEMLEAK. Signed-off-by:
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- Oct 05, 2012
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Hein Tibosch authored
Fix the warning: WARNING: vmlinux.o(.text+0x14cfd8): Section mismatch in reference from the variable compressed_formats to the function .init.text:gunzip() The function compressed_formats() references the function __init gunzip(). etc.. Within decompress.c, compressed_formats[] needs 'a __initdata annotation', because some of it's data members refer to functions which will be unloaded after init. Consequently, its user decompress_method() will get the __init prefix. Signed-off-by:
Hein Tibosch <hein_tibosch@yahoo.es> Cc: Albin Tonnerre <albin.tonnerre@free-electrons.com> Cc: Phillip Lougher <phillip@lougher.demon.co.uk> Cc: "H. Peter Anvin" <hpa@zytor.com> Signed-off-by:
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Tejun Heo authored
SG mapping iterator w/ SG_MITER_ATOMIC set required IRQ disabled because it originally used KM_BIO_SRC_IRQ to allow use from IRQ handlers. kmap_atomic() has long been updated to handle stacking atomic mapping requests on per-cpu basis and only requires not sleeping while mapped. Update sg_mapping_iter such that atomic iterators only require disabling preemption instead of disabling IRQ. While at it, convert wte weird @ARG@ notations to @ARG in the comment of sg_miter_start(). Signed-off-by:
Tejun Heo <tj@kernel.org> Cc: Maxim Levitsky <maximlevitsky@gmail.com> Cc: Alex Dubov <oakad@yahoo.com> Signed-off-by:
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Borislav Petkov authored
They show up in dmesg [ 4.041094] start plist test [ 4.045804] end plist test without a lot of meaning so hide them behind debug loglevel. Signed-off-by:
Borislav Petkov <borislav.petkov@amd.com> Cc: Lai Jiangshan <laijs@cn.fujitsu.com> Acked-by:
Steven Rostedt <rostedt@goodmis.org> Cc: Paul Gortmaker <paul.gortmaker@windriver.com> Signed-off-by:
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Jan Beulich authored
Xen's pciback points out a couple of deficiencies with vsscanf()'s standard conformance: - Trailing character matching cannot be checked by the caller: With a format string of "(%x:%x.%x) %n" absence of the closing parenthesis cannot be checked, as input of "(00:00.0)" doesn't cause the %n to be evaluated (because of the code not skipping white space before the trailing %n). - The parameter corresponding to a trailing %n could get filled even if there was a matching error: With a format string of "(%x:%x.%x)%n", input of "(00:00.0]" would still fill the respective variable pointed to (and hence again make the mismatch non-detectable by the caller). This patch aims at fixing those, but leaves other non-conforming aspects of it untouched, among them these possibly relevant ones: - improper handling of the assignment suppression character '*' (blindly discarding all succeeding non-white space from the format and input strings), - not honoring conversion specifiers for %n, - not recognizing the C99 conversion specifier 't' (recognized by vsprintf()). Signed-off-by:
Jan Beulich <jbeulich@suse.com> Cc: Konrad Rzeszutek Wilk <konrad.wilk@oracle.com> Signed-off-by:
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Vikram Mulukutla authored
The logic in do_raw_spin_lock() attempts to acquire a spinlock by invoking arch_spin_trylock() in a loop with a delay between each attempt. Now consider the following situation in a 2 CPU system: 1. CPU-0 continually acquires and releases a spinlock in a tight loop; it stays in this loop until some condition X is satisfied. X can only be satisfied by another CPU. 2. CPU-1 tries to acquire the same spinlock, in an attempt to satisfy the aforementioned condition X. However, it never sees the unlocked value of the lock because the debug spinlock code uses trylock instead of just lock; it checks at all the wrong moments - whenever CPU-0 has locked the lock. Now in the absence of debug spinlocks, the architecture specific spinlock code can correctly allow CPU-1 to wait in a "queue" (e.g., ticket spinlocks), ensuring that it acquires the lock at some point. However, with the debug spinlock code, livelock can easily occur due to the use of try_lock, which obviously cannot put the CPU in that "queue". This queueing mechanism is implemented in both x86 and ARM spinlock code. Note that the situation mentioned above is not hypothetical. A real problem was encountered where CPU-0 was running hrtimer_cancel with interrupts disabled, and CPU-1 was attempting to run the hrtimer that CPU-0 was trying to cancel. Address this by actually attempting arch_spin_lock once it is suspected that there is a spinlock lockup. If we're in a situation that is described above, the arch_spin_lock should succeed; otherwise other timeout mechanisms (e.g., watchdog) should alert the system of a lockup. Therefore, if there is a genuine system problem and the spinlock can't be acquired, the end result (irrespective of this change being present) is the same. If there is a livelock caused by the debug code, this change will allow the lock to be acquired, depending on the implementation of the lower level arch specific spinlock code. [akpm@linux-foundation.org: tweak comment] Signed-off-by:
Vikram Mulukutla <markivx@codeaurora.org> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: Peter Zijlstra <a.p.zijlstra@chello.nl> Signed-off-by:
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Benjamin Gaignard authored
Premit use of another algorithm than the default first-fit one. For example a custom algorithm could be used to manage alignment requirements. As I can't predict all the possible requirements/needs for all allocation uses cases, I add a "free" field 'void *data' to pass any needed information to the allocation function. For example 'data' could be used to handle a structure where you store the alignment, the expected memory bank, the requester device, or any information that could influence the allocation algorithm. An usage example may look like this: struct my_pool_constraints { int align; int bank; ... }; unsigned long my_custom_algo(unsigned long *map, unsigned long size, unsigned long start, unsigned int nr, void *data) { struct my_pool_constraints *constraints = data; ... deal with allocation contraints ... return the index in bitmap where perform the allocation } void create_my_pool() { struct my_pool_constraints c; struct gen_pool *pool = gen_pool_create(...); gen_pool_add(pool, ...); gen_pool_set_algo(pool, my_custom_algo, &c); } Add of best-fit algorithm function: most of the time best-fit is slower then first-fit but memory fragmentation is lower. The random buffer allocation/free tests don't show any arithmetic relation between the allocation time and fragmentation but the best-fit algorithm is sometime able to perform the allocation when the first-fit can't. This new algorithm help to remove static allocations on ESRAM, a small but fast on-chip RAM of few KB, used for high-performance uses cases like DMA linked lists, graphic accelerators, encoders/decoders. On the Ux500 (in the ARM tree) we have define 5 ESRAM banks of 128 KB each and use of static allocations becomes unmaintainable: cd arch/arm/mach-ux500 && grep -r ESRAM . ./include/mach/db8500-regs.h:/* Base address and bank offsets for ESRAM */ ./include/mach/db8500-regs.h:#define U8500_ESRAM_BASE 0x40000000 ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK_SIZE 0x00020000 ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK0 U8500_ESRAM_BASE ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK1 (U8500_ESRAM_BASE + U8500_ESRAM_BANK_SIZE) ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK2 (U8500_ESRAM_BANK1 + U8500_ESRAM_BANK_SIZE) ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK3 (U8500_ESRAM_BANK2 + U8500_ESRAM_BANK_SIZE) ./include/mach/db8500-regs.h:#define U8500_ESRAM_BANK4 (U8500_ESRAM_BANK3 + U8500_ESRAM_BANK_SIZE) ./include/mach/db8500-regs.h:#define U8500_ESRAM_DMA_LCPA_OFFSET 0x10000 ./include/mach/db8500-regs.h:#define U8500_DMA_LCPA_BASE (U8500_ESRAM_BANK0 + U8500_ESRAM_DMA_LCPA_OFFSET) ./include/mach/db8500-regs.h:#define U8500_DMA_LCLA_BASE U8500_ESRAM_BANK4 I want to use genalloc to do dynamic allocations but I need to be able to fine tune the allocation algorithm. I my case best-fit algorithm give better results than first-fit, but it will not be true for every use case. Signed-off-by:Benjamin Gaignard <benjamin.gaignard@stericsson.com> Cc: Huang Ying <ying.huang@intel.com> Signed-off-by:
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Davidlohr Bueso authored
Account for all properties when a and/or b are 0: gcd(0, 0) = 0 gcd(a, 0) = a gcd(0, b) = b Fixes no known problems in current kernels. Signed-off-by:
Davidlohr Bueso <dave@gnu.org> Cc: Eric Dumazet <eric.dumazet@gmail.com> Cc: <stable@vger.kernel.org> Signed-off-by:
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Jan Beulich authored
The main option should not appear in the resulting .config when the dependencies aren't met (i.e. use "depends on" rather than directly setting the default from the combined dependency values). The sub-options should depend on the main option rather than a more generic higher level one. Signed-off-by:
Don Zickus <dzickus@redhat.com> Cc: Peter Zijlstra <a.p.zijlstra@chello.nl> Signed-off-by:
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Alex Elder authored
The result of converting an integer value to another signed integer type that's unable to represent the original value is implementation defined. (See notes in section 6.3.1.3 of the C standard.) In match_number(), the result of simple_strtol() (which returns type long) is assigned to a value of type int. Instead, handle the result of simple_strtol() in a well-defined way, and return -ERANGE if the result won't fit in the int variable used to hold the parsed result. No current callers pay attention to the particular error value returned, so this additional return code shouldn't do any harm. [akpm@linux-foundation.org: coding-style tweaks] Signed-off-by:
Alex Elder <elder@inktank.com> Cc: Randy Dunlap <rdunlap@xenotime.net> Signed-off-by:
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Fengguang Wu authored
To avoid name conflicts: drivers/video/riva/fbdev.c:281:9: sparse: preprocessor token MAX_LEVEL redefined While at it, also make the other names more consistent and add parentheses. [akpm@linux-foundation.org: repair fallout] [sfr@canb.auug.org.au: IB/mlx4: fix for MAX_ID_MASK to MAX_IDR_MASK name change] Signed-off-by:
Fengguang Wu <fengguang.wu@intel.com> Cc: Bernd Petrovitsch <bernd@petrovitsch.priv.at> Cc: walter harms <wharms@bfs.de> Cc: Glauber Costa <glommer@parallels.com> Signed-off-by:
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Andy Shevchenko authored
Acked-by:
Andrei Emeltchenko <andrei.emeltchenko@intel.com> Signed-off-by:
Andy Shevchenko <andriy.shevchenko@linux.intel.com> Signed-off-by:
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George Spelvin authored
Numbering the 8 potential digits 2 though 9 never did make a lot of sense. Signed-off-by:
George Spelvin <linux@horizon.com> Cc: Denys Vlasenko <vda.linux@googlemail.com> Cc: Michal Nazarewicz <mina86@mina86.com> Signed-off-by:
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George Spelvin authored
If you're going to have a conditional branch after each 32x32->64-bit multiply, might as well shrink the code and make it a loop. This also avoids using the long multiply for small integers. (This leaves the comments in a confusing state, but that's a separate patch to make review easier.) Signed-off-by:
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George Spelvin authored
The same multiply-by-inverse technique can be used to convert division by 10000 to a 32x32->64-bit multiply. Signed-off-by:
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George Spelvin authored
Shrink the reciprocal approximations used in put_dec_full4() based on the comments in put_dec_full9(). Signed-off-by:
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Joe Mario authored
Fix the const sections for the code generated by crc32 table. There's no ro version of the cacheline aligned section, so we cannot put in const data without a conflict Just don't make the crc tables const for now. [ak@linux.intel.com: some fixes and new description] [akpm@linux-foundation.org: checkpatch fixes] Signed-off-by:
Joe Mario <jmario@redhat.com> Signed-off-by:
Andi Kleen <ak@linux.intel.com> Signed-off-by:
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