diff options
Diffstat (limited to 'Documentation')
26 files changed, 546 insertions, 147 deletions
diff --git a/Documentation/RCU/RTFP.txt b/Documentation/RCU/RTFP.txt index 273e654d7d08..2f0fcb2112d2 100644 --- a/Documentation/RCU/RTFP.txt +++ b/Documentation/RCU/RTFP.txt @@ -31,6 +31,14 @@ has lapsed, so this approach may be used in non-GPL software, if desired. (In contrast, implementation of RCU is permitted only in software licensed under either GPL or LGPL. Sorry!!!) +In 1987, Rashid et al. described lazy TLB-flush [RichardRashid87a]. +At first glance, this has nothing to do with RCU, but nevertheless +this paper helped inspire the update-side batching used in the later +RCU implementation in DYNIX/ptx. In 1988, Barbara Liskov published +a description of Argus that noted that use of out-of-date values can +be tolerated in some situations. Thus, this paper provides some early +theoretical justification for use of stale data. + In 1990, Pugh [Pugh90] noted that explicitly tracking which threads were reading a given data structure permitted deferred free to operate in the presence of non-terminating threads. However, this explicit @@ -41,11 +49,11 @@ providing a fine-grained locking design, however, it would be interesting to see how much of the performance advantage reported in 1990 remains today. -At about this same time, Adams [Adams91] described ``chaotic relaxation'', -where the normal barriers between successive iterations of convergent -numerical algorithms are relaxed, so that iteration $n$ might use -data from iteration $n-1$ or even $n-2$. This introduces error, -which typically slows convergence and thus increases the number of +At about this same time, Andrews [Andrews91textbook] described ``chaotic +relaxation'', where the normal barriers between successive iterations +of convergent numerical algorithms are relaxed, so that iteration $n$ +might use data from iteration $n-1$ or even $n-2$. This introduces +error, which typically slows convergence and thus increases the number of iterations required. However, this increase is sometimes more than made up for by a reduction in the number of expensive barrier operations, which are otherwise required to synchronize the threads at the end @@ -55,7 +63,8 @@ is thus inapplicable to most data structures in operating-system kernels. In 1992, Henry (now Alexia) Massalin completed a dissertation advising parallel programmers to defer processing when feasible to simplify -synchronization. RCU makes extremely heavy use of this advice. +synchronization [HMassalinPhD]. RCU makes extremely heavy use of +this advice. In 1993, Jacobson [Jacobson93] verbally described what is perhaps the simplest deferred-free technique: simply waiting a fixed amount of time @@ -90,27 +99,29 @@ mechanism, which is quite similar to RCU [Gamsa99]. These operating systems made pervasive use of RCU in place of "existence locks", which greatly simplifies locking hierarchies and helps avoid deadlocks. -2001 saw the first RCU presentation involving Linux [McKenney01a] -at OLS. The resulting abundance of RCU patches was presented the -following year [McKenney02a], and use of RCU in dcache was first -described that same year [Linder02a]. +The year 2000 saw an email exchange that would likely have +led to yet another independent invention of something like RCU +[RustyRussell2000a,RustyRussell2000b]. Instead, 2001 saw the first +RCU presentation involving Linux [McKenney01a] at OLS. The resulting +abundance of RCU patches was presented the following year [McKenney02a], +and use of RCU in dcache was first described that same year [Linder02a]. Also in 2002, Michael [Michael02b,Michael02a] presented "hazard-pointer" techniques that defer the destruction of data structures to simplify non-blocking synchronization (wait-free synchronization, lock-free synchronization, and obstruction-free synchronization are all examples of -non-blocking synchronization). In particular, this technique eliminates -locking, reduces contention, reduces memory latency for readers, and -parallelizes pipeline stalls and memory latency for writers. However, -these techniques still impose significant read-side overhead in the -form of memory barriers. Researchers at Sun worked along similar lines -in the same timeframe [HerlihyLM02]. These techniques can be thought -of as inside-out reference counts, where the count is represented by the -number of hazard pointers referencing a given data structure rather than -the more conventional counter field within the data structure itself. -The key advantage of inside-out reference counts is that they can be -stored in immortal variables, thus allowing races between access and -deletion to be avoided. +non-blocking synchronization). The corresponding journal article appeared +in 2004 [MagedMichael04a]. This technique eliminates locking, reduces +contention, reduces memory latency for readers, and parallelizes pipeline +stalls and memory latency for writers. However, these techniques still +impose significant read-side overhead in the form of memory barriers. +Researchers at Sun worked along similar lines in the same timeframe +[HerlihyLM02]. These techniques can be thought of as inside-out reference +counts, where the count is represented by the number of hazard pointers +referencing a given data structure rather than the more conventional +counter field within the data structure itself. The key advantage +of inside-out reference counts is that they can be stored in immortal +variables, thus allowing races between access and deletion to be avoided. By the same token, RCU can be thought of as a "bulk reference count", where some form of reference counter covers all reference by a given CPU @@ -123,8 +134,10 @@ can be thought of in other terms as well. In 2003, the K42 group described how RCU could be used to create hot-pluggable implementations of operating-system functions [Appavoo03a]. -Later that year saw a paper describing an RCU implementation of System -V IPC [Arcangeli03], and an introduction to RCU in Linux Journal +Later that year saw a paper describing an RCU implementation +of System V IPC [Arcangeli03] (following up on a suggestion by +Hugh Dickins [Dickins02a] and an implementation by Mingming Cao +[MingmingCao2002IPCRCU]), and an introduction to RCU in Linux Journal [McKenney03a]. 2004 has seen a Linux-Journal article on use of RCU in dcache @@ -383,6 +396,21 @@ for Programming Languages and Operating Systems}" } } +@phdthesis{HMassalinPhD +,author="H. Massalin" +,title="Synthesis: An Efficient Implementation of Fundamental Operating +System Services" +,school="Columbia University" +,address="New York, NY" +,year="1992" +,annotation={ + Mondo optimizing compiler. + Wait-free stuff. + Good advice: defer work to avoid synchronization. See page 90 + (PDF page 106), Section 5.4, fourth bullet point. +} +} + @unpublished{Jacobson93 ,author="Van Jacobson" ,title="Avoid Read-Side Locking Via Delayed Free" @@ -671,6 +699,20 @@ Orran Krieger and Rusty Russell and Dipankar Sarma and Maneesh Soni" [Viewed October 18, 2004]" } +@conference{Michael02b +,author="Maged M. Michael" +,title="High Performance Dynamic Lock-Free Hash Tables and List-Based Sets" +,Year="2002" +,Month="August" +,booktitle="{Proceedings of the 14\textsuperscript{th} Annual ACM +Symposium on Parallel +Algorithms and Architecture}" +,pages="73-82" +,annotation={ +Like the title says... +} +} + @Conference{Linder02a ,Author="Hanna Linder and Dipankar Sarma and Maneesh Soni" ,Title="Scalability of the Directory Entry Cache" @@ -727,6 +769,24 @@ Andrea Arcangeli and Andi Kleen and Orran Krieger and Rusty Russell" } } +@conference{Michael02a +,author="Maged M. Michael" +,title="Safe Memory Reclamation for Dynamic Lock-Free Objects Using Atomic +Reads and Writes" +,Year="2002" +,Month="August" +,booktitle="{Proceedings of the 21\textsuperscript{st} Annual ACM +Symposium on Principles of Distributed Computing}" +,pages="21-30" +,annotation={ + Each thread keeps an array of pointers to items that it is + currently referencing. Sort of an inside-out garbage collection + mechanism, but one that requires the accessing code to explicitly + state its needs. Also requires read-side memory barriers on + most architectures. +} +} + @unpublished{Dickins02a ,author="Hugh Dickins" ,title="Use RCU for System-V IPC" @@ -735,6 +795,17 @@ Andrea Arcangeli and Andi Kleen and Orran Krieger and Rusty Russell" ,note="private communication" } +@InProceedings{HerlihyLM02 +,author={Maurice Herlihy and Victor Luchangco and Mark Moir} +,title="The Repeat Offender Problem: A Mechanism for Supporting Dynamic-Sized, +Lock-Free Data Structures" +,booktitle={Proceedings of 16\textsuperscript{th} International +Symposium on Distributed Computing} +,year=2002 +,month="October" +,pages="339-353" +} + @unpublished{Sarma02b ,Author="Dipankar Sarma" ,Title="Some dcache\_rcu benchmark numbers" @@ -749,6 +820,19 @@ Andrea Arcangeli and Andi Kleen and Orran Krieger and Rusty Russell" } } +@unpublished{MingmingCao2002IPCRCU +,Author="Mingming Cao" +,Title="[PATCH]updated ipc lock patch" +,month="October" +,year="2002" +,note="Available: +\url{https://lkml.org/lkml/2002/10/24/262} +[Viewed February 15, 2014]" +,annotation={ + Mingming Cao's patch to introduce RCU to SysV IPC. +} +} + @unpublished{LinusTorvalds2003a ,Author="Linus Torvalds" ,Title="Re: {[PATCH]} small fixes in brlock.h" @@ -982,6 +1066,23 @@ Realtime Applications" } } +@article{MagedMichael04a +,author="Maged M. Michael" +,title="Hazard Pointers: Safe Memory Reclamation for Lock-Free Objects" +,Year="2004" +,Month="June" +,journal="IEEE Transactions on Parallel and Distributed Systems" +,volume="15" +,number="6" +,pages="491-504" +,url="Available: +\url{http://www.research.ibm.com/people/m/michael/ieeetpds-2004.pdf} +[Viewed March 1, 2005]" +,annotation={ + New canonical hazard-pointer citation. +} +} + @phdthesis{PaulEdwardMcKenneyPhD ,author="Paul E. McKenney" ,title="Exploiting Deferred Destruction: diff --git a/Documentation/RCU/checklist.txt b/Documentation/RCU/checklist.txt index 91266193b8f4..9d10d1db16a5 100644 --- a/Documentation/RCU/checklist.txt +++ b/Documentation/RCU/checklist.txt @@ -256,10 +256,10 @@ over a rather long period of time, but improvements are always welcome! variations on this theme. b. Limiting update rate. For example, if updates occur only - once per hour, then no explicit rate limiting is required, - unless your system is already badly broken. The dcache - subsystem takes this approach -- updates are guarded - by a global lock, limiting their rate. + once per hour, then no explicit rate limiting is + required, unless your system is already badly broken. + Older versions of the dcache subsystem take this approach, + guarding updates with a global lock, limiting their rate. c. Trusted update -- if updates can only be done manually by superuser or some other trusted user, then it might not @@ -268,7 +268,8 @@ over a rather long period of time, but improvements are always welcome! the machine. d. Use call_rcu_bh() rather than call_rcu(), in order to take - advantage of call_rcu_bh()'s faster grace periods. + advantage of call_rcu_bh()'s faster grace periods. (This + is only a partial solution, though.) e. Periodically invoke synchronize_rcu(), permitting a limited number of updates per grace period. @@ -276,6 +277,13 @@ over a rather long period of time, but improvements are always welcome! The same cautions apply to call_rcu_bh(), call_rcu_sched(), call_srcu(), and kfree_rcu(). + Note that although these primitives do take action to avoid memory + exhaustion when any given CPU has too many callbacks, a determined + user could still exhaust memory. This is especially the case + if a system with a large number of CPUs has been configured to + offload all of its RCU callbacks onto a single CPU, or if the + system has relatively little free memory. + 9. All RCU list-traversal primitives, which include rcu_dereference(), list_for_each_entry_rcu(), and list_for_each_safe_rcu(), must be either within an RCU read-side diff --git a/Documentation/arm64/memory.txt b/Documentation/arm64/memory.txt index 5e054bfe4dde..85e24c4f215c 100644 --- a/Documentation/arm64/memory.txt +++ b/Documentation/arm64/memory.txt @@ -35,11 +35,13 @@ ffffffbc00000000 ffffffbdffffffff 8GB vmemmap ffffffbe00000000 ffffffbffbbfffff ~8GB [guard, future vmmemap] -ffffffbffbc00000 ffffffbffbdfffff 2MB earlyprintk device +ffffffbffa000000 ffffffbffaffffff 16MB PCI I/O space + +ffffffbffb000000 ffffffbffbbfffff 12MB [guard] -ffffffbffbe00000 ffffffbffbe0ffff 64KB PCI I/O space +ffffffbffbc00000 ffffffbffbdfffff 2MB earlyprintk device -ffffffbffbe10000 ffffffbcffffffff ~2MB [guard] +ffffffbffbe00000 ffffffbffbffffff 2MB [guard] ffffffbffc000000 ffffffbfffffffff 64MB modules @@ -60,11 +62,13 @@ fffffdfc00000000 fffffdfdffffffff 8GB vmemmap fffffdfe00000000 fffffdfffbbfffff ~8GB [guard, future vmmemap] -fffffdfffbc00000 fffffdfffbdfffff 2MB earlyprintk device +fffffdfffa000000 fffffdfffaffffff 16MB PCI I/O space + +fffffdfffb000000 fffffdfffbbfffff 12MB [guard] -fffffdfffbe00000 fffffdfffbe0ffff 64KB PCI I/O space +fffffdfffbc00000 fffffdfffbdfffff 2MB earlyprintk device -fffffdfffbe10000 fffffdfffbffffff ~2MB [guard] +fffffdfffbe00000 fffffdfffbffffff 2MB [guard] fffffdfffc000000 fffffdffffffffff 64MB modules diff --git a/Documentation/device-mapper/cache.txt b/Documentation/device-mapper/cache.txt index e6b72d355151..68c0f517c60e 100644 --- a/Documentation/device-mapper/cache.txt +++ b/Documentation/device-mapper/cache.txt @@ -124,12 +124,11 @@ the default being 204800 sectors (or 100MB). Updating on-disk metadata ------------------------- -On-disk metadata is committed every time a REQ_SYNC or REQ_FUA bio is -written. If no such requests are made then commits will occur every -second. This means the cache behaves like a physical disk that has a -write cache (the same is true of the thin-provisioning target). If -power is lost you may lose some recent writes. The metadata should -always be consistent in spite of any crash. +On-disk metadata is committed every time a FLUSH or FUA bio is written. +If no such requests are made then commits will occur every second. This +means the cache behaves like a physical disk that has a volatile write +cache. If power is lost you may lose some recent writes. The metadata +should always be consistent in spite of any crash. The 'dirty' state for a cache block changes far too frequently for us to keep updating it on the fly. So we treat it as a hint. In normal diff --git a/Documentation/device-mapper/thin-provisioning.txt b/Documentation/device-mapper/thin-provisioning.txt index 8a7a3d46e0da..05a27e9442bd 100644 --- a/Documentation/device-mapper/thin-provisioning.txt +++ b/Documentation/device-mapper/thin-provisioning.txt @@ -116,6 +116,35 @@ Resuming a device with a new table itself triggers an event so the userspace daemon can use this to detect a situation where a new table already exceeds the threshold. +A low water mark for the metadata device is maintained in the kernel and +will trigger a dm event if free space on the metadata device drops below +it. + +Updating on-disk metadata +------------------------- + +On-disk metadata is committed every time a FLUSH or FUA bio is written. +If no such requests are made then commits will occur every second. This +means the thin-provisioning target behaves like a physical disk that has +a volatile write cache. If power is lost you may lose some recent +writes. The metadata should always be consistent in spite of any crash. + +If data space is exhausted the pool will either error or queue IO +according to the configuration (see: error_if_no_space). If metadata +space is exhausted or a metadata operation fails: the pool will error IO +until the pool is taken offline and repair is performed to 1) fix any +potential inconsistencies and 2) clear the flag that imposes repair. +Once the pool's metadata device is repaired it may be resized, which +will allow the pool to return to normal operation. Note that if a pool +is flagged as needing repair, the pool's data and metadata devices +cannot be resized until repair is performed. It should also be noted +that when the pool's metadata space is exhausted the current metadata +transaction is aborted. Given that the pool will cache IO whose +completion may have already been acknowledged to upper IO layers +(e.g. filesystem) it is strongly suggested that consistency checks +(e.g. fsck) be performed on those layers when repair of the pool is +required. + Thin provisioning ----------------- @@ -258,10 +287,9 @@ ii) Status should register for the event and then check the target's status. held metadata root: - The location, in sectors, of the metadata root that has been + The location, in blocks, of the metadata root that has been 'held' for userspace read access. '-' indicates there is no - held root. This feature is not yet implemented so '-' is - always returned. + held root. discard_passdown|no_discard_passdown Whether or not discards are actually being passed down to the diff --git a/Documentation/devicetree/bindings/arm/armada-370-xp-mpic.txt b/Documentation/devicetree/bindings/arm/armada-370-xp-mpic.txt index d74091a8a3bf..5fc03134a999 100644 --- a/Documentation/devicetree/bindings/arm/armada-370-xp-mpic.txt +++ b/Documentation/devicetree/bindings/arm/armada-370-xp-mpic.txt @@ -1,4 +1,4 @@ -Marvell Armada 370 and Armada XP Interrupt Controller +Marvell Armada 370, 375, 38x, XP Interrupt Controller ----------------------------------------------------- Required properties: @@ -16,7 +16,13 @@ Required properties: automatically map to the interrupt controller registers of the current CPU) +Optional properties: +- interrupts: If defined, then it indicates that this MPIC is + connected as a slave to another interrupt controller. This is + typically the case on Armada 375 and Armada 38x, where the MPIC is + connected as a slave to the Cortex-A9 GIC. The provided interrupt + indicate to which GIC interrupt the MPIC output is connected. Example: diff --git a/Documentation/devicetree/bindings/ata/ahci-platform.txt b/Documentation/devicetree/bindings/ata/ahci-platform.txt index 89de1564950c..48b285ffa3a6 100644 --- a/Documentation/devicetree/bindings/ata/ahci-platform.txt +++ b/Documentation/devicetree/bindings/ata/ahci-platform.txt @@ -4,17 +4,33 @@ SATA nodes are defined to describe on-chip Serial ATA controllers. Each SATA controller should have its own node. Required properties: -- compatible : compatible list, contains "snps,spear-ahci" +- compatible : compatible list, one of "snps,spear-ahci", + "snps,exynos5440-ahci", "ibm,476gtr-ahci", + "allwinner,sun4i-a10-ahci", "fsl,imx53-ahci" + "fsl,imx6q-ahci" or "snps,dwc-ahci" - interrupts : <interrupt mapping for SATA IRQ> - reg : <registers mapping> Optional properties: - dma-coherent : Present if dma operations are coherent +- clocks : a list of phandle + clock specifier pairs +- target-supply : regulator for SATA target power -Example: +"fsl,imx53-ahci", "fsl,imx6q-ahci" required properties: +- clocks : must contain the sata, sata_ref and ahb clocks +- clock-names : must contain "ahb" for the ahb clock + +Examples: sata@ffe08000 { compatible = "snps,spear-ahci"; reg = <0xffe08000 0x1000>; interrupts = <115>; - }; + + ahci: sata@01c18000 { + compatible = "allwinner,sun4i-a10-ahci"; + reg = <0x01c18000 0x1000>; + interrupts = <56>; + clocks = <&pll6 0>, <&ahb_gates 25>; + target-supply = <®_ahci_5v>; + }; diff --git a/Documentation/devicetree/bindings/ata/apm-xgene.txt b/Documentation/devicetree/bindings/ata/apm-xgene.txt new file mode 100644 index 000000000000..7bcfbf59810e --- /dev/null +++ b/Documentation/devicetree/bindings/ata/apm-xgene.txt @@ -0,0 +1,76 @@ +* APM X-Gene 6.0 Gb/s SATA host controller nodes + +SATA host controller nodes are defined to describe on-chip Serial ATA +controllers. Each SATA controller (pair of ports) have its own node. + +Required properties: +- compatible : Shall contain: + * "apm,xgene-ahci" +- reg : First memory resource shall be the AHCI memory + resource. + Second memory resource shall be the host controller + core memory resource. + Third memory resource shall be the host controller + diagnostic memory resource. + 4th memory resource shall be the host controller + AXI memory resource. + 5th optional memory resource shall be the host + controller MUX memory resource if required. +- interrupts : Interrupt-specifier for SATA host controller IRQ. +- clocks : Reference to the clock entry. +- phys : A list of phandles + phy-specifiers, one for each + entry in phy-names. +- phy-names : Should contain: + * "sata-phy" for the SATA 6.0Gbps PHY + +Optional properties: +- status : Shall be "ok" if enabled or "disabled" if disabled. + Default is "ok". + +Example: + sataclk: sataclk { + compatible = "fixed-clock"; + #clock-cells = <1>; + clock-frequency = <100000000>; + clock-output-names = "sataclk"; + }; + + phy2: phy@1f22a000 { + compatible = "apm,xgene-phy"; + reg = <0x0 0x1f22a000 0x0 0x100>; + #phy-cells = <1>; + }; + + phy3: phy@1f23a000 { + compatible = "apm,xgene-phy"; + reg = <0x0 0x1f23a000 0x0 0x100>; + #phy-cells = <1>; + }; + + sata2: sata@1a400000 { + compatible = "apm,xgene-ahci"; + reg = <0x0 0x1a400000 0x0 0x1000>, + <0x0 0x1f220000 0x0 0x1000>, + <0x0 0x1f22d000 0x0 0x1000>, + <0x0 0x1f22e000 0x0 0x1000>, + <0x0 0x1f227000 0x0 0x1000>; + interrupts = <0x0 0x87 0x4>; + status = "ok"; + clocks = <&sataclk 0>; + phys = <&phy2 0>; + phy-names = "sata-phy"; + }; + + sata3: sata@1a800000 { + compatible = "apm,xgene-ahci-pcie"; + reg = <0x0 0x1a800000 0x0 0x1000>, + <0x0 0x1f230000 0x0 0x1000>, + <0x0 0x1f23d000 0x0 0x1000>, + <0x0 0x1f23e000 0x0 0x1000>, + <0x0 0x1f237000 0x0 0x1000>; + interrupts = <0x0 0x88 0x4>; + status = "ok"; + clocks = <&sataclk 0>; + phys = <&phy3 0>; + phy-names = "sata-phy"; + }; diff --git a/Documentation/devicetree/bindings/clock/renesas,cpg-mstp-clocks.txt b/Documentation/devicetree/bindings/clock/renesas,cpg-mstp-clocks.txt index a6a352c2771e..5992dceec7af 100644 --- a/Documentation/devicetree/bindings/clock/renesas,cpg-mstp-clocks.txt +++ b/Documentation/devicetree/bindings/clock/renesas,cpg-mstp-clocks.txt @@ -21,9 +21,9 @@ Required Properties: must appear in the same order as the output clocks. - #clock-cells: Must be 1 - clock-output-names: The name of the clocks as free-form strings - - renesas,indices: Indices of the gate clocks into the group (0 to 31) + - renesas,clock-indices: Indices of the gate clocks into the group (0 to 31) -The clocks, clock-output-names and renesas,indices properties contain one +The clocks, clock-output-names and renesas,clock-indices properties contain one entry per gate clock. The MSTP groups are sparsely populated. Unimplemented gate clocks must not be declared. diff --git a/Documentation/devicetree/bindings/dma/fsl-imx-sdma.txt b/Documentation/devicetree/bindings/dma/fsl-imx-sdma.txt index 68b83ecc3850..ee9be9961524 100644 --- a/Documentation/devicetree/bindings/dma/fsl-imx-sdma.txt +++ b/Documentation/devicetree/bindings/dma/fsl-imx-sdma.txt @@ -1,12 +1,16 @@ * Freescale Smart Direct Memory Access (SDMA) Controller for i.MX Required properties: -- compatible : Should be "fsl,imx31-sdma", "fsl,imx31-to1-sdma", - "fsl,imx31-to2-sdma", "fsl,imx35-sdma", "fsl,imx35-to1-sdma", - "fsl,imx35-to2-sdma", "fsl,imx51-sdma", "fsl,imx53-sdma" or - "fsl,imx6q-sdma". The -to variants should be preferred since they - allow to determnine the correct ROM script addresses needed for - the driver to work without additional firmware. +- compatible : Should be one of + "fsl,imx25-sdma" + "fsl,imx31-sdma", "fsl,imx31-to1-sdma", "fsl,imx31-to2-sdma" + "fsl,imx35-sdma", "fsl,imx35-to1-sdma", "fsl,imx35-to2-sdma" + "fsl,imx51-sdma" + "fsl,imx53-sdma" + "fsl,imx6q-sdma" + The -to variants should be preferred since they allow to determnine the + correct ROM script addresses needed for the driver to work without additional + firmware. - reg : Should contain SDMA registers location and length - interrupts : Should contain SDMA interrupt - #dma-cells : Must be <3>. diff --git a/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun4i-ic.txt b/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun4i-ic.txt index 32cec4b26cd0..b290ca150d30 100644 --- a/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun4i-ic.txt +++ b/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun4i-ic.txt @@ -2,7 +2,7 @@ Allwinner Sunxi Interrupt Controller Required properties: -- compatible : should be "allwinner,sun4i-ic" +- compatible : should be "allwinner,sun4i-a10-ic" - reg : Specifies base physical address and size of the registers. - interrupt-controller : Identifies the node as an interrupt controller - #interrupt-cells : Specifies the number of cells needed to encode an @@ -11,7 +11,7 @@ Required properties: Example: intc: interrupt-controller { - compatible = "allwinner,sun4i-ic"; + compatible = "allwinner,sun4i-a10-ic"; reg = <0x01c20400 0x400>; interrupt-controller; #interrupt-cells = <1>; diff --git a/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun67i-sc-nmi.txt b/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun67i-sc-nmi.txt new file mode 100644 index 000000000000..d1c5cdabc3e0 --- /dev/null +++ b/Documentation/devicetree/bindings/interrupt-controller/allwinner,sun67i-sc-nmi.txt @@ -0,0 +1,27 @@ +Allwinner Sunxi NMI Controller +============================== + +Required properties: + +- compatible : should be "allwinner,sun7i-a20-sc-nmi" or + "allwinner,sun6i-a31-sc-nmi" +- reg : Specifies base physical address and size of the registers. +- interrupt-controller : Identifies the node as an interrupt controller +- #interrupt-cells : Specifies the number of cells needed to encode an + interrupt source. The value shall be 2. The first cell is the IRQ number, the + second cell the trigger type as defined in interrupt.txt in this directory. +- interrupt-parent: Specifies the parent interrupt controller. +- interrupts: Specifies the interrupt line (NMI) which is handled by + the interrupt controller in the parent controller's notation. This value + shall be the NMI. + +Example: + +sc-nmi-intc@01c00030 { + compatible = "allwinner,sun7i-a20-sc-nmi"; + interrupt-controller; + #interrupt-cells = <2>; + reg = <0x01c00030 0x0c>; + interrupt-parent = <&gic>; + interrupts = <0 0 4>; +}; diff --git a/Documentation/devicetree/bindings/net/micrel-ks8851.txt b/Documentation/devicetree/bindings/net/micrel-ks8851.txt index 11ace3c3d805..4fc392763611 100644 --- a/Documentation/devicetree/bindings/net/micrel-ks8851.txt +++ b/Documentation/devicetree/bindings/net/micrel-ks8851.txt @@ -7,3 +7,4 @@ Required properties: Optional properties: - local-mac-address : Ethernet mac address to use +- vdd-supply: supply for Ethernet mac diff --git a/Documentation/devicetree/bindings/net/opencores-ethoc.txt b/Documentation/devicetree/bindings/net/opencores-ethoc.txt new file mode 100644 index 000000000000..2dc127c30d9b --- /dev/null +++ b/Documentation/devicetree/bindings/net/opencores-ethoc.txt @@ -0,0 +1,22 @@ +* OpenCores MAC 10/100 Mbps + +Required properties: +- compatible: Should be "opencores,ethoc". +- reg: two memory regions (address and length), + first region is for the device registers and descriptor rings, + second is for the device packet memory. +- interrupts: interrupt for the device. + +Optional properties: +- clocks: phandle to refer to the clk used as per + Documentation/devicetree/bindings/clock/clock-bindings.txt + +Examples: + + enet0: ethoc@fd030000 { + compatible = "opencores,ethoc"; + reg = <0xfd030000 0x4000 0xfd800000 0x4000>; + interrupts = <1>; + local-mac-address = [00 50 c2 13 6f 00]; + clocks = <&osc>; + }; diff --git a/Documentation/devicetree/bindings/pinctrl/brcm,capri-pinctrl.txt b/Documentation/devicetree/bindings/pinctrl/brcm,bcm11351-pinctrl.txt index 9e9e9ef9f852..c119debe6bab 100644 --- a/Documentation/devicetree/bindings/pinctrl/brcm,capri-pinctrl.txt +++ b/Documentation/devicetree/bindings/pinctrl/brcm,bcm11351-pinctrl.txt @@ -1,4 +1,4 @@ -Broadcom Capri Pin Controller +Broadcom BCM281xx Pin Controller This is a pin controller for the Broadcom BCM281xx SoC family, which includes BCM11130, BCM11140, BCM11351, BCM28145, and BCM28155 SoCs. @@ -7,14 +7,14 @@ BCM11130, BCM11140, BCM11351, BCM28145, and BCM28155 SoCs. Required Properties: -- compatible: Must be "brcm,capri-pinctrl". +- compatible: Must be "brcm,bcm11351-pinctrl" - reg: Base address of the PAD Controller register block and the size of the block. For example, the following is the bare minimum node: pinctrl@35004800 { - compatible = "brcm,capri-pinctrl"; + compatible = "brcm,bcm11351-pinctrl"; reg = <0x35004800 0x430>; }; @@ -119,7 +119,7 @@ Optional Properties (for HDMI pins): Example: // pin controller node pinctrl@35004800 { - compatible = "brcm,capri-pinctrl"; + compatible = "brcmbcm11351-pinctrl"; reg = <0x35004800 0x430>; // pin configuration node diff --git a/Documentation/devicetree/bindings/timer/allwinner,sun4i-timer.txt b/Documentation/devicetree/bindings/timer/allwinner,sun4i-timer.txt index 48aeb7884ed3..5c2e23574ca0 100644 --- a/Documentation/devicetree/bindings/timer/allwinner,sun4i-timer.txt +++ b/Documentation/devicetree/bindings/timer/allwinner,sun4i-timer.txt @@ -2,7 +2,7 @@ Allwinner A1X SoCs Timer Controller Required properties: -- compatible : should be "allwinner,sun4i-timer" +- compatible : should be "allwinner,sun4i-a10-timer" - reg : Specifies base physical address and size of the registers. - interrupts : The interrupt of the first timer - clocks: phandle to the source clock (usually a 24 MHz fixed clock) @@ -10,7 +10,7 @@ Required properties: Example: timer { - compatible = "allwinner,sun4i-timer"; + compatible = "allwinner,sun4i-a10-timer"; reg = <0x01c20c00 0x400>; interrupts = <22>; clocks = <&osc>; diff --git a/Documentation/devicetree/bindings/timer/ti,keystone-timer.txt b/Documentation/devicetree/bindings/timer/ti,keystone-timer.txt new file mode 100644 index 000000000000..5fbe361252b4 --- /dev/null +++ b/Documentation/devicetree/bindings/timer/ti,keystone-timer.txt @@ -0,0 +1,29 @@ +* Device tree bindings for Texas instruments Keystone timer + +This document provides bindings for the 64-bit timer in the KeyStone +architecture devices. The timer can be configured as a general-purpose 64-bit +timer, dual general-purpose 32-bit timers. When configured as dual 32-bit +timers, each half can operate in conjunction (chain mode) or independently +(unchained mode) of each other. + +It is global timer is a free running up-counter and can generate interrupt +when the counter reaches preset counter values. + +Documentation: +http://www.ti.com/lit/ug/sprugv5a/sprugv5a.pdf + +Required properties: + +- compatible : should be "ti,keystone-timer". +- reg : specifies base physical address and count of the registers. +- interrupts : interrupt generated by the timer. +- clocks : the clock feeding the timer clock. + +Example: + +timer@22f0000 { + compatible = "ti,keystone-timer"; + reg = <0x022f0000 0x80>; + interrupts = <GIC_SPI 110 IRQ_TYPE_EDGE_RISING>; + clocks = <&clktimer15>; +}; diff --git a/Documentation/kernel-parameters.txt b/Documentation/kernel-parameters.txt index 7116fda7077f..67755ea834a7 100644 --- a/Documentation/kernel-parameters.txt +++ b/Documentation/kernel-parameters.txt @@ -1011,6 +1011,13 @@ bytes respectively. Such letter suffixes can also be entirely omitted. parameter will force ia64_sal_cache_flush to call ia64_pal_cache_flush instead of SAL_CACHE_FLUSH. + forcepae [X86-32] + Forcefully enable Physical Address Extension (PAE). + Many Pentium M systems disable PAE but may have a + functionally usable PAE implementation. + Warning: use of this parameter will taint the kernel + and may cause unknown problems. + ftrace=[tracer] [FTRACE] will set and start the specified tracer as early as possible in order to facilitate early @@ -2053,8 +2060,8 @@ bytes respectively. Such letter suffixes can also be entirely omitted. IOAPICs that may be present in the system. nokaslr [X86] - Disable kernel base offset ASLR (Address Space - Layout Randomization) if built into the kernel. + Disable kernel and module base offset ASLR (Address + Space Layout Randomization) if built into the kernel. noautogroup Disable scheduler automatic task group creation. diff --git a/Documentation/kernel-per-CPU-kthreads.txt b/Documentation/kernel-per-CPU-kthreads.txt index 827104fb9364..f3cd299fcc41 100644 --- a/Documentation/kernel-per-CPU-kthreads.txt +++ b/Documentation/kernel-per-CPU-kthreads.txt @@ -162,7 +162,18 @@ Purpose: Execute workqueue requests To reduce its OS jitter, do any of the following: 1. Run your workload at a real-time priority, which will allow preempting the kworker daemons. -2. Do any of the following needed to avoid jitter that your +2. A given workqueue can be made visible in the sysfs filesystem + by passing the WQ_SYSFS to that workqueue's alloc_workqueue(). + Such a workqueue can be confined to a given subset of the + CPUs using the /sys/devices/virtual/workqueue/*/cpumask sysfs + files. The set of WQ_SYSFS workqueues can be displayed using + "ls sys/devices/virtual/workqueue". That said, the workqueues + maintainer would like to caution people against indiscriminately + sprinkling WQ_SYSFS across all the workqueues. The reason for + caution is that it is easy to add WQ_SYSFS, but because sysfs is + part of the formal user/kernel API, it can be nearly impossible + to remove it, even if its addition was a mistake. +3. Do any of the following needed to avoid jitter that your application cannot tolerate: a. Build your kernel with CONFIG_SLUB=y rather than CONFIG_SLAB=y, thus avoiding the slab allocator's periodic diff --git a/Documentation/memory-barriers.txt b/Documentation/memory-barriers.txt index 102dc19c4119..11c1d2049662 100644 --- a/Documentation/memory-barriers.txt +++ b/Documentation/memory-barriers.txt @@ -608,26 +608,30 @@ as follows: b = p; /* BUG: Compiler can reorder!!! */ do_something(); -The solution is again ACCESS_ONCE(), which preserves the ordering between -the load from variable 'a' and the store to variable 'b': +The solution is again ACCESS_ONCE() and barrier(), which preserves the +ordering between the load from variable 'a' and the store to variable 'b': q = ACCESS_ONCE(a); if (q) { + barrier(); ACCESS_ONCE(b) = p; do_something(); } else { + barrier(); ACCESS_ONCE(b) = p; do_something_else(); } -You could also use barrier() to prevent the compiler from moving -the stores to variable 'b', but barrier() would not prevent the -compiler from proving to itself that a==1 always, so ACCESS_ONCE() -is also needed. +The initial ACCESS_ONCE() is required to prevent the compiler from +proving the value of 'a', and the pair of barrier() invocations are +required to prevent the compiler from pulling the two identical stores +to 'b' out from the legs of the "if" statement. It is important to note that control dependencies absolutely require a a conditional. For example, the following "optimized" version of -the above example breaks ordering: +the above example breaks ordering, which is why the barrier() invocations +are absolutely required if you have identical stores in both legs of +the "if" statement: q = ACCESS_ONCE(a); ACCESS_ONCE(b) = p; /* BUG: No ordering vs. load from a!!! */ @@ -643,9 +647,11 @@ It is of course legal for the prior load to be part of the conditional, for example, as follows: if (ACCESS_ONCE(a) > 0) { + barrier(); ACCESS_ONCE(b) = q / 2; do_something(); } else { + barrier(); ACCESS_ONCE(b) = q / 3; do_something_else(); } @@ -659,9 +665,11 @@ the needed conditional. For example: q = ACCESS_ONCE(a); if (q % MAX) { + barrier(); ACCESS_ONCE(b) = p; do_something(); } else { + barrier(); ACCESS_ONCE(b) = p; do_something_else(); } @@ -723,8 +731,13 @@ In summary: use smb_rmb(), smp_wmb(), or, in the case of prior stores and later loads, smp_mb(). + (*) If both legs of the "if" statement begin with identical stores + to the same variable, a barrier() statement is required at the + beginning of each leg of the "if" statement. + (*) Control dependencies require at least one run-time conditional - between the prior load and the subsequent store. If the compiler + between the prior load and the subsequent store, and this + conditional must involve the prior load. If the compiler is able to optimize the conditional away, it will have also optimized away the ordering. Careful use of ACCESS_ONCE() can help to preserve the needed conditional. @@ -1249,6 +1262,23 @@ The ACCESS_ONCE() function can prevent any number of optimizations that, while perfectly safe in single-threaded code, can be fatal in concurrent code. Here are some examples of these sorts of optimizations: + (*) The compiler is within its rights to reorder loads and stores + to the same variable, and in some cases, the CPU is within its + rights to reorder loads to the same variable. This means that + the following code: + + a[0] = x; + a[1] = x; + + Might result in an older value of x stored in a[1] than in a[0]. + Prevent both the compiler and the CPU from doing this as follows: + + a[0] = ACCESS_ONCE(x); + a[1] = ACCESS_ONCE(x); + + In short, ACCESS_ONCE() provides cache coherence for accesses from + multiple CPUs to a single variable. + (*) The compiler is within its rights to merge successive loads from the same variable. Such merging can cause the compiler to "optimize" the following code: @@ -1644,12 +1674,12 @@ for each construct. These operations all imply certain barriers: Memory operations issued after the ACQUIRE will be completed after the ACQUIRE operation has completed. - Memory operations issued before the ACQUIRE may be completed after the - ACQUIRE operation has completed. An smp_mb__before_spinlock(), combined - with a following ACQUIRE, orders prior loads against subsequent stores and - stores and prior stores against subsequent stores. Note that this is - weaker than smp_mb()! The smp_mb__before_spinlock() primitive is free on - many architectures. + Memory operations issued before the ACQUIRE may be completed after + the ACQUIRE operation has completed. An smp_mb__before_spinlock(), + combined with a following ACQUIRE, orders prior loads against + subsequent loads and stores and also orders prior stores against + subsequent stores. Note that this is weaker than smp_mb()! The + smp_mb__before_spinlock() primitive is free on many architectures. (2) RELEASE operation implication: @@ -1694,24 +1724,21 @@ may occur as: ACQUIRE M, STORE *B, STORE *A, RELEASE M -This same reordering can of course occur if the lock's ACQUIRE and RELEASE are -to the same lock variable, but only from the perspective of another CPU not -holding that lock. - -In short, a RELEASE followed by an ACQUIRE may -not- be assumed to be a full -memory barrier because it is possible for a preceding RELEASE to pass a -later ACQUIRE from the viewpoint of the CPU, but not from the viewpoint -of the compiler. Note that deadlocks cannot be introduced by this -interchange because if such a deadlock threatened, the RELEASE would -simply complete. - -If it is necessary for a RELEASE-ACQUIRE pair to produce a full barrier, the -ACQUIRE can be followed by an smp_mb__after_unlock_lock() invocation. This -will produce a full barrier if either (a) the RELEASE and the ACQUIRE are -executed by the same CPU or task, or (b) the RELEASE and ACQUIRE act on the -same variable. The smp_mb__after_unlock_lock() primitive is free on many -architectures. Without smp_mb__after_unlock_lock(), the critical sections -corresponding to the RELEASE and the ACQUIRE can cross: +When the ACQUIRE and RELEASE are a lock acquisition and release, +respectively, this same reordering can occur if the lock's ACQUIRE and +RELEASE are to the same lock variable, but only from the perspective of +another CPU not holding that lock. In short, a ACQUIRE followed by an +RELEASE may -not- be assumed to be a full memory barrier. + +Similarly, the reverse case of a RELEASE followed by an ACQUIRE does not +imply a full memory barrier. If it is necessary for a RELEASE-ACQUIRE +pair to produce a full barrier, the ACQUIRE can be followed by an +smp_mb__after_unlock_lock() invocation. This will produce a full barrier +if either (a) the RELEASE and the ACQUIRE are executed by the same +CPU or task, or (b) the RELEASE and ACQUIRE act on the same variable. +The smp_mb__after_unlock_lock() primitive is free on many architectures. +Without smp_mb__after_unlock_lock(), the CPU's execution of the critical +sections corresponding to the RELEASE and the ACQUIRE can cross, so that: *A = a; RELEASE M @@ -1722,7 +1749,36 @@ could occur as: ACQUIRE N, STORE *B, STORE *A, RELEASE M -With smp_mb__after_unlock_lock(), they cannot, so that: +It might appear that this reordering could introduce a deadlock. +However, this cannot happen because if such a deadlock threatened, +the RELEASE would simply complete, thereby avoiding the deadlock. + + Why does this work? + + One key point is that we are only talking about the CPU doing + the reordering, not the compiler. If the compiler (or, for + that matter, the developer) switched the operations, deadlock + -could- occur. + + But suppose the CPU reordered the operations. In this case, + the unlock precedes the lock in the assembly code. The CPU + simply elected to try executing the later lock operation first. + If there is a deadlock, this lock operation will simply spin (or + try to sleep, but more on that later). The CPU will eventually + execute the unlock operation (which preceded the lock operation + in the assembly code), which will unravel the potential deadlock, + allowing the lock operation to succeed. + + But what if the lock is a sleeplock? In that case, the code will + try to enter the scheduler, where it will eventually encounter + a memory barrier, which will force the earlier unlock operation + to complete, again unraveling the deadlock. There might be + a sleep-unlock race, but the locking primitive needs to resolve + such races properly in any case. + +With smp_mb__after_unlock_lock(), the two critical sections cannot overlap. +For example, with the following code, the store to *A will always be +seen by other CPUs before the store to *B: *A = a; RELEASE M @@ -1730,13 +1786,18 @@ With smp_mb__after_unlock_lock(), they cannot, so that: smp_mb__after_unlock_lock(); *B = b; -will always occur as either of the following: +The operations will always occur in one of the following orders: - STORE *A, RELEASE, ACQUIRE, STORE *B - STORE *A, ACQUIRE, RELEASE, STORE *B + STORE *A, RELEASE, ACQUIRE, smp_mb__after_unlock_lock(), STORE *B + STORE *A, ACQUIRE, RELEASE, smp_mb__after_unlock_lock(), STORE *B + ACQUIRE, STORE *A, RELEASE, smp_mb__after_unlock_lock(), STORE *B If the RELEASE and ACQUIRE were instead both operating on the same lock -variable, only the first of these two alternatives can occur. +variable, only the first of these alternatives can occur. In addition, +the more strongly ordered systems may rule out some of the above orders. +But in any case, as noted earlier, the smp_mb__after_unlock_lock() +ensures that the store to *A will always be seen as happening before +the store to *B. Locks and semaphores may not provide any guarantee of ordering on UP compiled systems, and so cannot be counted on in such a situation to actually achieve @@ -2757,7 +2818,7 @@ in that order, but, without intervention, the sequence may have almost any combination of elements combined or discarded, provided the program's view of the world remains consistent. Note that ACCESS_ONCE() is -not- optional in the above example, as there are architectures where a given CPU might -interchange successive loads to the same location. On such architectures, +reorder successive loads to the same location. On such architectures, ACCESS_ONCE() does whatever is necessary to prevent this, for example, on Itanium the volatile casts used by ACCESS_ONCE() cause GCC to emit the special ld.acq and st.rel instructions that prevent such reordering. diff --git a/Documentation/networking/can.txt b/Documentation/networking/can.txt index f3089d423515..0cbe6ec22d6f 100644 --- a/Documentation/networking/can.txt +++ b/Documentation/networking/can.txt @@ -554,12 +554,6 @@ solution for a couple of reasons: not specified in the struct can_frame and therefore it is only valid in CANFD_MTU sized CAN FD frames. - As long as the payload length is <=8 the received CAN frames from CAN FD - capable CAN devices can be received and read by legacy sockets too. When - user-generated CAN FD frames have a payload length <=8 these can be send - by legacy CAN network interfaces too. Sending CAN FD frames with payload - length > 8 to a legacy CAN network interface returns an -EMSGSIZE error. - Implementation hint for new CAN applications: To build a CAN FD aware application use struct canfd_frame as basic CAN diff --git a/Documentation/networking/netlink_mmap.txt b/Documentation/networking/netlink_mmap.txt index b26122973525..c6af4bac5aa8 100644 --- a/Documentation/networking/netlink_mmap.txt +++ b/Documentation/networking/netlink_mmap.txt @@ -226,9 +226,9 @@ Ring setup: void *rx_ring, *tx_ring; /* Configure ring parameters */ - if (setsockopt(fd, NETLINK_RX_RING, &req, sizeof(req)) < 0) + if (setsockopt(fd, SOL_NETLINK, NETLINK_RX_RING, &req, sizeof(req)) < 0) exit(1); - if (setsockopt(fd, NETLINK_TX_RING, &req, sizeof(req)) < 0) + if (setsockopt(fd, SOL_NETLINK, NETLINK_TX_RING, &req, sizeof(req)) < 0) exit(1) /* Calculate size of each individual ring */ diff --git a/Documentation/networking/packet_mmap.txt b/Documentation/networking/packet_mmap.txt index 1404674c0a02..6fea79efb4cb 100644 --- a/Documentation/networking/packet_mmap.txt +++ b/Documentation/networking/packet_mmap.txt @@ -453,7 +453,7 @@ TP_STATUS_COPY : This flag indicates that the frame (and associated enabled previously with setsockopt() and the PACKET_COPY_THRESH option. - The number of frames than can be buffered to + The number of frames that can be buffered to be read with recvfrom is limited like a normal socket. See the SO_RCVBUF option in the socket (7) man page. diff --git a/Documentation/networking/timestamping.txt b/Documentation/networking/timestamping.txt index 661d3c316a17..048c92b487f6 100644 --- a/Documentation/networking/timestamping.txt +++ b/Documentation/networking/timestamping.txt @@ -21,26 +21,38 @@ has such a feature). SO_TIMESTAMPING: -Instructs the socket layer which kind of information is wanted. The -parameter is an integer with some of the following bits set. Setting -other bits is an error and doesn't change the current state. - -SOF_TIMESTAMPING_TX_HARDWARE: try to obtain send time stamp in hardware -SOF_TIMESTAMPING_TX_SOFTWARE: if SOF_TIMESTAMPING_TX_HARDWARE is off or - fails, then do it in software -SOF_TIMESTAMPING_RX_HARDWARE: return the original, unmodified time stamp - as generated by the hardware -SOF_TIMESTAMPING_RX_SOFTWARE: if SOF_TIMESTAMPING_RX_HARDWARE is off or - fails, then do it in software -SOF_TIMESTAMPING_RAW_HARDWARE: return original raw hardware time stamp -SOF_TIMESTAMPING_SYS_HARDWARE: return hardware time stamp transformed to - the system time base -SOF_TIMESTAMPING_SOFTWARE: return system time stamp generated in - software - -SOF_TIMESTAMPING_TX/RX determine how time stamps are generated. -SOF_TIMESTAMPING_RAW/SYS determine how they are reported in the -following control message: +Instructs the socket layer which kind of information should be collected +and/or reported. The parameter is an integer with some of the following +bits set. Setting other bits is an error and doesn't change the current +state. + +Four of the bits are requests to the stack to try to generate +timestamps. Any combination of them is valid. + +SOF_TIMESTAMPING_TX_HARDWARE: try to obtain send time stamps in hardware +SOF_TIMESTAMPING_TX_SOFTWARE: try to obtain send time stamps in software +SOF_TIMESTAMPING_RX_HARDWARE: try to obtain receive time stamps in hardware +SOF_TIMESTAMPING_RX_SOFTWARE: try to obtain receive time stamps in software + +The other three bits control which timestamps will be reported in a +generated control message. If none of these bits are set or if none of +the set bits correspond to data that is available, then the control +message will not be generated: + +SOF_TIMESTAMPING_SOFTWARE: report systime if available +SOF_TIMESTAMPING_SYS_HARDWARE: report hwtimetrans if available +SOF_TIMESTAMPING_RAW_HARDWARE: report hwtimeraw if available + +It is worth noting that timestamps may be collected for reasons other +than being requested by a particular socket with +SOF_TIMESTAMPING_[TR]X_(HARD|SOFT)WARE. For example, most drivers that +can generate hardware receive timestamps ignore +SOF_TIMESTAMPING_RX_HARDWARE. It is still a good idea to set that flag +in case future drivers pay attention. + +If timestamps are reported, they will appear in a control message with +cmsg_level==SOL_SOCKET, cmsg_type==SO_TIMESTAMPING, and a payload like +this: struct scm_timestamping { struct timespec systime; diff --git a/Documentation/sysctl/kernel.txt b/Documentation/sysctl/kernel.txt index e55124e7c40c..ec8be46bf48d 100644 --- a/Documentation/sysctl/kernel.txt +++ b/Documentation/sysctl/kernel.txt @@ -320,10 +320,11 @@ This file shows up if CONFIG_DETECT_HUNG_TASK is enabled. ============================================================== -hung_task_warning: +hung_task_warnings: The maximum number of warnings to report. During a check interval -When this value is reached, no more the warnings will be reported. +if a hung task is detected, this value is decreased by 1. +When this value reaches 0, no more warnings will be reported. This file shows up if CONFIG_DETECT_HUNG_TASK is enabled. -1: report an infinite number of warnings. @@ -441,8 +442,7 @@ feature should be disabled. Otherwise, if the system overhead from the feature is too high then the rate the kernel samples for NUMA hinting faults may be controlled by the numa_balancing_scan_period_min_ms, numa_balancing_scan_delay_ms, numa_balancing_scan_period_max_ms, -numa_balancing_scan_size_mb, numa_balancing_settle_count sysctls and -numa_balancing_migrate_deferred. +numa_balancing_scan_size_mb, and numa_balancing_settle_count sysctls. ============================================================== @@ -483,13 +483,6 @@ rate for each task. numa_balancing_scan_size_mb is how many megabytes worth of pages are scanned for a given scan. -numa_balancing_migrate_deferred is how many page migrations get skipped -unconditionally, after a page migration is skipped because a page is shared -with other tasks. This reduces page migration overhead, and determines -how much stronger the "move task near its memory" policy scheduler becomes, -versus the "move memory near its task" memory management policy, for workloads -with shared memory. - ============================================================== osrelease, ostype & version: diff --git a/Documentation/x86/boot.txt b/Documentation/x86/boot.txt index cb81741d3b0b..a75e3adaa39d 100644 --- a/Documentation/x86/boot.txt +++ b/Documentation/x86/boot.txt @@ -182,7 +182,7 @@ Offset Proto Name Meaning 0226/1 2.02+(3 ext_loader_ver Extended boot loader version 0227/1 2.02+(3 ext_loader_type Extended boot loader ID 0228/4 2.02+ cmd_line_ptr 32-bit pointer to the kernel command line -022C/4 2.03+ ramdisk_max Highest legal initrd address +022C/4 2.03+ initrd_addr_max Highest legal initrd address 0230/4 2.05+ kernel_alignment Physical addr alignment required for kernel 0234/1 2.05+ relocatable_kernel Whether kernel is relocatable or not 0235/1 2.10+ min_alignment Minimum alignment, as a power of two @@ -534,7 +534,7 @@ Protocol: 2.02+ zero, the kernel will assume that your boot loader does not support the 2.02+ protocol. -Field name: ramdisk_max +Field name: initrd_addr_max Type: read Offset/size: 0x22c/4 Protocol: 2.03+ |