2022Q3
Date of Issue: 20th October 2022
This document describes the Procedure Call Standard use by the Application Binary Interface (ABI) for the Arm architecture.
Procedure call, function call, calling conventions, data layout
Please check Application Binary Interface for the Arm® Architecture for the latest release of this document.
Please report defects in this specification to the issue tracker page on GitHub.
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Contents
- 1 Preamble
- 2 About This Document
- 3 Scope
- 4 Introduction
- 5 Data Types and Alignment
- 6 The Base Procedure Call Standard
- 7 The Standard Variants
- 8 Arm C and C++ Language Mappings
- 9 APPENDIX: Support for Advanced SIMD Extensions and MVE
The following support level definitions are used by the Arm ABI specifications:
- Release
- Arm considers this specification to have enough implementations, which have received sufficient testing, to verify that it is correct. The details of these criteria are dependent on the scale and complexity of the change over previous versions: small, simple changes might only require one implementation, but more complex changes require multiple independent implementations, which have been rigorously tested for cross-compatibility. Arm anticipates that future changes to this specification will be limited to typographical corrections, clarifications and compatible extensions.
- Beta
- Arm considers this specification to be complete, but existing implementations do not meet the requirements for confidence in its release quality. Arm may need to make incompatible changes if issues emerge from its implementation.
- Alpha
- The content of this specification is a draft, and Arm considers the likelihood of future incompatible changes to be significant.
All content in this document is at the Release quality level.
If there is no entry in the change history table for a release, there are no changes to the content of the document for that release.
| Issue | Date | Change |
|---|---|---|
| 1.0 | 30th October 2003 | First public release. |
| 2.0 | 24th March 2005 | Second public release. |
| 2.01 | 5th July 2005 | Added clarifying remark following Additional data types
– word-sized enumeration contains are int if possible
(Enumerated Types) |
| 2.02 | 4th August 2005 | Clarify that a callee may modify stack space used for incoming parameters. |
| 2.03 | 7th October 2005 | Added notes concerning VFPv3 D16-D31 (VFP register usage conventions); retracted requirement that plain bit-fields be unsigned by default (Bit-fields (C mappings)) |
| 2.04 | 4th May 2006 | Clarified when linking may insert veneers that corrupt r12 and the condition codes (Use of IP by the linker). |
| 2.05 | 19th January 2007 | Update for the Advanced SIMD Extension. |
| 2.06 | 2nd October 2007 | Add support for half-precision floating point. |
| A | 25th October 2007 | Document renumbered (formerly GENC-003534 v2.06). |
| B | 2nd April 2008 | Simplify duplicated text relating to VFP calling and clarify that homogeneous aggregates of containerized vectors are limited to four members in calling convention (VFP co-processor register candidates). |
| C | 10th October 2008 | Clarify that __va_list is in namespace std. Specify containers for oversized enums. State truth values for _Bool/bool. Clarify some wording with respect to homogeneous aggregates and argument marshalling of VFP CPRCs. |
| D | 16th October 2009 | Re-wrote Enumerated Types to better reflect the intentions for enumerated types in ABI-complying interfaces. |
| E 2.09 | 30th November 2012 | Clarify that memory passed for a function result may be modified at any point during the function call (Result Return (base PCS)). Changed the illustrative source name of the half-precision float type from __f16 to __fp16 to match [ACLE] (Arithmetic Types). Re-wrote APPENDIX: Support for Advanced SIMD Extensions and MVE to clarify requirements on Advanced SIMD types. |
| F | 24th October 2015 | SIMD vector data types, corrected the element counts of poly16x4_t and poly16x8_t. Added [u]int64x1_t, [u]int64x2_t, poly64x2_t. Allow half-precision floating point types as function parameter and return types, by specifying how half-precision floating point types are passed and returned in registers Result Return (base PCS), Parameter Passing (base PCS), Mapping between registers and memory format, VFP co-processor register candidates). Added parameter passing rules for over-aligned types (Composite Types, Parameter Passing (base PCS)). |
| 2018Q4 | 21st December 2018 | In Volatile bit-fields – preserving number and width of container accesses, relaxed the rules regarding accesses to volatile bitfield members to be compatible with the C/C++ memory model. In Stack probing, relaxed the rules regarding stack accesses to permit stack probing. In VFP register usage conventions, corrected the rules regarding the values of the IDC and IDE bits of the FPSCR register on a public interface. |
| 2019Q4 | 28th January 2020 | Be more specific on the use of frame pointers and frame records. (The Frame Pointer, Machine Registers). Add description of half-precision Brain floating-point format (Half-precision Floating Point, Arm Alternative Format Half-precision Floating Point values, Arithmetic Types). For clarity, renamed half-precision format 'Alternative' to 'Arm Alternative' (Half-precision Floating Point, Arm Alternative Format Half-precision Floating Point values, Half-precision Format Compatibility, Mapping of C & C++ built-in data types). |
| 2020Q2 | 1st July 2020 | Correct minus signs not rendering in sections Bit-field extraction expressions and Over-sized bit-fields. Clarify the AAPCS rules for volatile zero length bit-fields in section Volatile bit-fields – preserving number and width of container accesses. |
| 2020Q4 | 21st December 2020 |
|
| 2021Q1 | 12th April 2021 | Clarify what it means for a VFP CPRC argument to be correctly aligned. |
This document refers to, or is referred to by, the following documents.
| Ref | External URL | Title |
|---|---|---|
| AAPCS32 | This document | Procedure Call Standard for the Arm Architecture |
| AAELF32 | ELF for the Arm Architecture | |
| BSABI32 | ABI for the Arm Architecture (Base Standard) | |
| CPPABI32 | C++ ABI for the Arm Architecture | |
| ARMARM | Arm DDI 0100E, ISBN 0 201 737191 https://developer.arm.com/docs/ddi0100/latest/armv5-architecture-reference-manual |
The Arm Architecture Reference Manual 2nd edition, edited by David Seal, published by Addison-Wessley. |
Arm DDI 0406 |
Arm Architecture Reference Manual Arm v7-A and Arm v7-R edition | |
| ACLE | IHI 0053A | Arm C Language Extensions |
| GCPPABI | http://itanium-cxx-abi.github.io/ | Generic C++ ABI |
This document uses the following terms and abbreviations.
- ABI
Application Binary Interface:
- The specifications to which an executable must conform in order to execute in a specific execution environment. For example, the Linux ABI for the Arm Architecture.
- A particular aspect of the specifications to which independently produced relocatable files must conform in order to be statically linkable and executable. For example, the C++ ABI for the Arm Architecture [CPPABI32], the Run-time ABI for the Arm Architecture [RTABI32], the C Library ABI for the Arm Architecture [CLIBABI32].
- Arm-based
- based on the Arm architecture
- EABI
- An ABI suited to the needs of embedded (sometimes called free standing) applications.
- PCS
- Procedure Call Standard.
- AAPCS
- Procedure Call Standard for the Arm Architecture (this standard).
- APCS
- Arm Procedure Call Standard (obsolete).
- TPCS
- Thumb Procedure Call Standard (obsolete).
- ATPCS
- Arm-Thumb Procedure Call Standard (precursor to this standard).
- PIC / PID
- Position-independent code, position-independent data.
- Routine / subroutine
- A fragment of program to which control can be transferred that, on completing its task, returns control to its caller at an instruction following the call. Routine is used for clarity where there are nested calls: a routine is the caller and a subroutine is the callee.
- Procedure
- A routine that returns no result value.
- Function
- A routine that returns a result value.
- Activation stack / call-frame stack
- The stack of routine activation records (call frames).
- Activation record / call frame
- The memory used by a routine for saving registers and holding local variables (usually allocated on a stack, once per activation of the routine).
- Argument / Parameter
- The terms argument and parameter are used interchangeably. They may denote a formal parameter of a routine given the value of the actual parameter when the routine is called, or an actual parameter, according to context.
- Externally visible [interface]
- [An interface] between separately compiled or separately assembled routines.
- Variadic routine
- A routine is variadic if the number of arguments it takes, and their type, is determined by the caller instead of the callee.
- Global register
- A register whose value is neither saved nor destroyed by a subroutine. The value may be updated, but only in a manner defined by the execution environment.
- Program state
- The state of the program’s memory, including values in machine registers.
- Scratch register / temporary register
- A register used to hold an intermediate value during a calculation (usually, such values are not named in the program source and have a limited lifetime).
- Thumb-1
- The variant of the Thumb instruction set introduced in Arm v4T and used in Arm v6-M and the Arm v8-M.Baseline variants of the architecture. It consists of instructions that are predominantly encoded with 16-bit opcodes.
- Thumb-2
- The variant of the Thumb instruction set introduced in Arm v6T2. It consists of a mix of instructions encoded with 16- and 32-bit opcodes.
- Variable register / v-register
- A register used to hold the value of a variable, usually one local to a routine, and often named in the source code.
More specific terminology is defined when it is first used.
This specification has been developed with the active support of the following organizations. In alphabetical order: Arm, CodeSourcery, Intel, Metrowerks, Montavista, Nexus Electronics, PalmSource, Symbian, Texas Instruments, and Wind River.
The AAPCS defines how subroutines can be separately written, separately compiled, and separately assembled to work together. It describes a contract between a calling routine and a called routine that defines:
- Obligations on the caller to create a program state in which the called routine may start to execute.
- Obligations on the called routine to preserve the program state of the caller across the call.
- The rights of the called routine to alter the program state of its caller.
This standard specifies the base for a family of Procedure Call Standard (PCS) variants generated by choices that reflect alternative priorities among:
- Code size.
- Performance.
- Functionality (for example, ease of debugging, run-time checking, support for shared libraries).
Some aspects of each variant – for example the allowable use of R9 – are determined by the execution environment. Thus:
- It is possible for code complying strictly with the base standard to be PCS compatible with each of the variants.
- It is unusual for code complying with a variant to be compatible with code complying with any other variant.
- Code complying with a variant, or with the base standard, is not guaranteed to be compatible with an execution environment that requires those standards. An execution environment may make further demands beyond the scope of the procedure call standard.
This standard is presented in four sections that, after an introduction, specify:
- The layout of data.
- Layout of the stack and calling between functions with public interfaces.
- Variations available for processor extensions, or when the execution environment restricts the addressing model.
- The C and C++ language bindings for plain data types.
This specification does not standardize the representation of publicly visible C++-language entities that are not also C language entities (these are described in CPPABI32) and it places no requirements on the representation of language entities that are not visible across public interfaces.
The AAPCS embodies the fifth major revision of the APCS and third major revision of the TPCS. It forms part of the complete ABI specification for the Arm Architecture.
The goals of the AAPCS are to:
- Support Thumb-state and Arm-state equally.
- Support inter-working between Thumb-state and Arm-state.
- Support efficient execution on high-performance implementations of the Arm Architecture.
- Clearly distinguish between mandatory requirements and implementation discretion.
- Minimize the binary incompatibility with the ATPCS.
The AAPCS defines how separately compiled and separately assembled routines can work together. There is an externally visible interface between such routines. It is common that not all the externally visible interfaces to software are intended to be publicly visible or open to arbitrary use. In effect, there is a mismatch between the machine-level concept of external visibility—defined rigorously by an object code format—and a higher level, application-oriented concept of external visibility—which is system-specific or application-specific.
Conformance to the AAPCS requires that[1]:
- At all times, stack limits and basic stack alignment are observed (Universal stack constraints).
- At each call where the control transfer instruction is subject to a BL-type relocation at static link time, rules on the use of IP are observed (Use of IP by the linker).
- The routines of each publicly visible interface conform to the relevant procedure call standard variant.
- The data elements[2] of each publicly visible interface conform to the data layout rules.
The following table shows the fundamental data types (Machine Types) of the machine. A NULL pointer is always represented by all-bits-zero.
| Type Class | Machine Type | Byte size | Byte alignment | Note |
|---|---|---|---|---|
| Integral | Unsigned byte | 1 | 1 | Character |
| Signed byte | 1 | 1 | ||
| Unsigned half-word | 2 | 2 | ||
| Signed half-word | 2 | 2 | ||
| Unsigned word | 4 | 4 | ||
| Signed word | 4 | 4 | ||
| Unsigned double-word | 8 | 8 | ||
| Signed double-word | 8 | 8 | ||
| Floating Point | Half precision | 2 | 2 | See Half-precision Floating Point. |
| Single precision (IEEE 754) | 4 | 4 | The encoding of floating point numbers is described in [ARMARM] chapter C2, VFP Programmer's Model, §2.1.1 Single-precision format, and §2.1.2 Double-precision format. | |
| Double precision (IEEE 754) | 8 | 8 | ||
| Containerized vector | 64-bit vector | 8 | 8 | See Containerized Vectors. |
| 128-bit vector | 16 | 8 | ||
| Pointer | Data pointer | 4 | 4 | Pointer arithmetic should be unsigned. Bit 0 of a code pointer indicates the target instruction set type (0 Arm, 1 Thumb). |
| Code pointer | 4 | 4 |
Optional extensions to the Arm architecture provide hardware support for half-precision values. Three formats are currently supported:
1 - half-precision format specified in IEEE754-2008
2 - Arm Alternative format, which provides additional range but has no NaNs or Infinities.
3 - Brain floating-point format, which provides a dynamic range similar to the 32-bit floating-point format, but with less precision.
The first two formats are mutually exclusive. The base standard of the AAPCS specifies use of the IEEE754-2008 variant, and a procedure call variant that uses the Arm Alternative format is permitted.
The content of a containerized vector is opaque to most of the procedure call standard: the only defined aspect of its layout is the mapping between the memory format (the way a fundamental type is stored in memory) and different classes of register at a procedure call interface. If a language binding defines data types that map directly onto the containerized vectors it will define how this mapping is performed.
From a software perspective, memory is an array of bytes, each of which is addressable.
This ABI supports two views of memory implemented by the underlying hardware.
- In a little-endian view of memory the least significant byte of a data object is at the lowest byte address the data object occupies in memory.
- In a big-endian view of memory the least significant byte of a data object is at the highest byte address the data object occupies in memory.
The least significant bit in an object is always designated as bit 0.
The mapping of a word-sized data object to memory is shown in the diagrams below. All objects are pure-endian, so the mappings may be scaled accordingly for larger or smaller objects [3].
Memory layout of big-endian data object
Memory layout of little-endian data object
A Composite Type is a collection of one or more Fundamental Data Types that are handled as a single entity at the procedure call level. A Composite Type can be any of:
- An aggregate, where the members are laid out sequentially in memory
- A union, where each of the members has the same address
- An array, which is a repeated sequence of some other type (its base type).
The definitions are recursive; that is, each of the types may contain a Composite Type as a member.
- The member alignment of an element of a composite type is the alignment of that member after the application of any language alignment modifiers to that member
- The natural alignment of a composite type is the maximum of each of the member alignments of the 'top-level' members of the composite type i.e. before any alignment adjustment of the entire composite is applied
- The alignment of an aggregate shall be the alignment of its most-aligned component.
- The size of an aggregate shall be the smallest multiple of its alignment that is sufficient to hold all of its members when they are laid out according to these rules.
- The alignment of a union shall be the alignment of its most-aligned component.
- The size of a union shall be the smallest multiple of its alignment that is sufficient to hold its largest member.
- The alignment of an array shall be the alignment of its base type.
- The size of an array shall be the size of the base type multiplied by the number of elements in the array.
A member of an aggregate that is a Fundamental Data Type may be subdivided into bit-fields; if there are unused portions of such a member that are sufficient to start the following member at its natural alignment then the following member may use the unallocated portion. For the purposes of calculating the alignment of the aggregate the type of the member shall be the Fundamental Data Type upon which the bit-field is based. [4] The layout of bit-fields within an aggregate is defined by the appropriate language binding (see Arm C and C++ Language Mappings).
A Homogeneous Aggregate is a Composite Type where all of the Fundamental Data Types that compose the type are the same. The test for homogeneity is applied after data layout is completed and without regard to access control or other source language restrictions.
An aggregate consisting of containerized vector types is treated as homogeneous if all the members are of the same size, even if the internal format of the containerized members are different. For example, a structure containing a vector of 8 bytes and a vector of 4 half-words satisfies the requirements for a homogeneous aggregate.
A Homogeneous Aggregate has a Base Type, which is the Fundamental Data Type of each Element. The overall size is the size of the Base Type multiplied by the number of Elements; its alignment will be the alignment of the Base Type.
The base standard defines a machine-level, core-registers-only calling standard common to the Arm and Thumb instruction sets. It should be used for systems where there is no floating-point hardware, or where a high degree of inter-working with Thumb code is required.
The Arm architecture defines a core instruction set plus a number of additional instructions implemented by co-processors. The core instruction set can access the core registers and co-processors can provide additional registers which are available for specific operations.
There are 16, 32-bit core (integer) registers visible to the Arm and Thumb instruction sets. These are labeled r0-r15 or R0-R15. Register names may appear in assembly language in either upper case or lower case. In this specification upper case is used when the register has a fixed role in the procedure call standard. The following table summarizes the uses of the core registers in this standard. In addition to the core registers there is one status register (CPSR) that is available for use in conforming code.
| Register | Synonym | Special | Role in the procedure call standard |
|---|---|---|---|
| r15 | PC | The Program Counter. | |
| r14 | LR | The Link Register. | |
| r13 | SP | The Stack Pointer. | |
| r12 | IP | The Intra-Procedure-call scratch register. | |
| r11 | v8 | FP | Frame Pointer or Variable-register 8. |
| r10 | v7 | Variable-register 7. | |
| r9 | v6 SB TR |
Platform register. The meaning of this register is defined by the platform standard. |
|
| r8 | v5 | Variable-register 5. | |
| r7 | v4 | Variable-register 4. | |
| r6 | v3 | Variable-register 3. | |
| r5 | v2 | Variable-register 2. | |
| r4 | v1 | Variable-register 1. | |
| r3 | a4 | Argument / scratch register 4. | |
| r2 | a3 | Argument / scratch register 3. | |
| r1 | a2 | Argument / result / scratch register 2. | |
| r0 | a1 | Argument / result / scratch register 1. |
The first four registers r0-r3 (a1-a4) are used to pass argument values into a subroutine and to return a result value from a function. They may also be used to hold intermediate values within a routine (but, in general, only between subroutine calls).
Register r12 (IP) may be used by a linker as a scratch register between a routine and any subroutine it calls (for details, see Use of IP by the linker). It can also be used within a routine to hold intermediate values between subroutine calls.
In some variants r11 (FP) may be used as a frame pointer in order to chain frame activation records into a linked list.
The role of register r9 is platform specific. A virtual platform may assign any role to this register and must document this usage. For example, it may designate it as the static base (SB) in a position-independent data model, or it may designate it as the thread register (TR) in an environment with thread-local storage. The usage of this register may require that the value held is persistent across all calls. A virtual platform that has no need for such a special register may designate r9 as an additional callee-saved variable register, v6.
Typically, the registers r4-r8, r10 and r11 (v1-v5, v7 and v8) are used to hold the values of a routine’s local variables. Of these, only v1-v4 can be used uniformly by the whole Thumb instruction set, but the AAPCS does not require that Thumb code only use those registers.
A subroutine must preserve the contents of the registers r4-r8, r10, r11 and SP (and r9 in PCS variants that designate r9 as v6).
In all variants of the procedure call standard, registers r12-r15 have special roles. In these roles they are labeled IP, SP, LR and PC.
The CPSR is a global register with the following properties:
- The N, Z, C, V and Q bits (bits 27-31) and the GE[3:0] bits (bits 16-19) are undefined on entry to or return from a public interface. The Q and GE[3:0] bits may only be modified when executing on a processor where these features are present.
- On Arm Architecture 6, the E bit (bit 8) can be used in applications executing in little-endian mode, or in big-endian-8 mode to temporarily change the endianness of data accesses to memory. An application must have a designated endianness and at entry to and return from any public interface the setting of the E bit must match the designated endianness of the application.
- The T bit (bit 5) and the J bit (bit 24) are the execution state bits. Only instructions designated for modifying these bits may change them.
- The A, I, F and M[4:0] bits (bits 0-7) are the privileged bits and may only be modified by applications designed to operate explicitly in a privileged mode.
- All other bits are reserved and must not be modified. It is not defined whether the bits read as zero or one, or whether they are preserved across a public interface.
Fundamental types larger than 32 bits may be passed as parameters to, or returned as the result of, function calls. When these types are in core registers the following rules apply:
- A double-word sized type is passed in two consecutive registers (e.g., r0
and r1, or r2 and r3). The content of the registers is as if the value
had been loaded from memory representation with a single
LDMinstruction. - A 128-bit containerized vector is passed in four consecutive registers.
The content of the registers is as if the value had been loaded from
memory with a single
LDMinstruction.
A machine’s register set may be extended with additional registers that are accessed via instructions in the co-processor instruction space. To the extent that such registers are not used for passing arguments to and from subroutine calls the use of co-processor registers is compatible with the base standard. Each co-processor may provide an additional set of rules that govern the usage of its registers.
Note
Even though co-processor registers are not used for passing arguments,
some elements of the run-time support for a language may require
knowledge of all co-processors in use in an application in order to
function correctly (for example, setjmp() in C and exceptions in
C++).
The VFP-v2 co-processor has 32 single-precision registers, s0-s31, which may also be accessed as 16 double-precision registers, d0-d15 (with d0 overlapping s0, s1; d1 overlapping s2, s3; etc). In addition there are 3 or more system registers, depending on the implementation. VFP-v3 adds 16 more double-precision registers d16-d31, but there are no additional single-precision counterparts. The Advanced SIMD Extension and the M-profile vector Extension (MVE) use the VFP register set. The Advanced SIMD Extension uses the double-precision registers for 64-bit vectors and further defines quad-word registers (with q0 overlapping d0, d1; and q1 overlapping d2, d3; etc) for 128-bit vectors. MVE uses 128-bit vectors in the same quad-word registers.
Registers s16-s31 (d8-d15, q4-q7) must be preserved across subroutine calls; registers s0-s15 (d0-d7, q0-q3) do not need to be preserved (and can be used for passing arguments or returning results in standard procedure-call variants). Registers d16-d31 (q8-q15), if present, do not need to be preserved.
The FPSCR and VPR registers are the only status registers that may be accessed by conforming code. FPSCR is a global register with the following properties:
- The condition code bits (28-31), the cumulative saturation (QC) bit (27) and the cumulative exception-status bits (0-4 and 7) are not preserved across a public interface.
- The exception-control bits (8-12 and 15), rounding mode bits (22-23) and flush-to-zero bits (24) may be modified by calls to specific support functions that affect the global state of the application.
- The length bits (16-18) must be 0b100 when using M-profile Vector Extension, 0b000 when using VFP vector mode and otherwise preserved across a public interface.
- The stride bits (20-21) must be zero on entry to and return from a public interface.
- All other bits are reserved and must not be modified. It is not defined whether the bits read as zero or one, or whether they are preserved across a public interface.
VPR is a global register with the following properties:
- The VPT mask bits (16-23) must be zero on entry to and return from a public interface.
- The predication bits (0-15) are not preserved across a public interface.
- All other bits are reserved and must not be modified. It is not defined whether the bits read as zero or one, or whether they are preserved across a public interface.
The AAPCS applies to a single thread of execution or process (hereafter referred to as a process). A process has a program state defined by the underlying machine registers and the contents of the memory it can access. The memory a process can access, without causing a run-time fault, may vary during the execution of the process.
The memory of a process can normally be classified into five categories:
- code (the program being executed), which must be readable, but need not be writable, by the process.
- read-only static data.
- writable static data.
- the heap.
- the stack.
Writable static data may be further sub-divided into initialized, zero-initialized and uninitialized data. Except for the stack there is no requirement for each class of memory to occupy a single contiguous region of memory. A process must always have some code and a stack, but need not have any of the other categories of memory.
The heap is an area (or areas) of memory that are managed by the process
itself (for example, with the C malloc function). It is typically used
for the creation of dynamic data objects.
A conforming program must only execute instructions that are in areas of memory designated to contain code.
The stack is a contiguous area of memory that may be used for storage of local variables and for passing additional arguments to subroutines when there are insufficient argument registers available.
The stack implementation is full-descending, with the current extent of the stack held in the register SP (r13). The stack will, in general, have both a base and a limit though in practice an application may not be able to determine the value of either.
The stack may have a fixed size or be dynamically extendable (by adjusting the stack-limit downwards).
The rules for maintenance of the stack are divided into two parts: a set of constraints that must be observed at all times, and an additional constraint that must be observed at a public interface.
At all times the following basic constraints must hold:
- Stack-limit ≤ SP ≤ stack-base. The stack pointer must lie within the extent of the stack.
- SP mod 4 = 0. The stack must at all times be aligned to a word boundary.
- A process may only store data in the closed interval of the entire stack delimited by [SP, stack base - 1] (where SP is the value of register r13).
Note
This implies that instructions of the following form can fail to satisfy
the stack discipline constraints, even when reg points within the
extent of the stack.
ldmxx reg, {..., sp, ...} // reg != sp
If execution of the instruction is interrupted after sp has been loaded, the stack extent will not be restored, so restarting the instruction might violate the third constraint.
The stack must also conform to the following constraint at a public interface:
- SP mod 8 = 0. The stack must be double-word aligned.
In order to ensure stack integrity a process may emit stack probes immediately prior to allocating additional stack space (moving SP from SP_old to SP_new). Stack probes must be in the region of [SP_new, SP_old - 1] and may be either read or write operations. The minimum interval for stack probing is defined by the target platform but must be a minimum of 4KBytes. No recoverable data can be saved below the currently allocated stack region.
A platform may require the construction of a list of stack frames describing the current call hierarchy in a program.
Each frame shall link to the frame of its caller by means of a Frame Record of two 32-bit values on the stack. The frame record for the innermost frame (belonging to the most recent routine invocation) shall be pointed to by the Frame Pointer register (FP). The lowest addressed word shall point to the previous frame record and the highest addressed word shall contain the value passed in LR on entry to the current function. The end of the frame record chain is indicated by the address zero in the address for the previous frame. The location of the frame record within a stack frame is not specified. The frame pointer register must not be updated until the new frame record has been fully constructed.
Note
There will always be a short period during construction or destruction of each frame record during which the frame pointer will point to the caller’s record.
A platform shall mandate the minimum level of conformance with respect to the maintenance of frame records. The options are, in decreasing level of functionality:
- It may require the frame pointer to address a valid frame record at all times, except that small subroutines which do not modify the link register may elect not to create a frame record
- It may require the frame pointer to address a valid frame record at all times, except that any subroutine may elect not to create a frame record
- It may permit the frame pointer register to be used as a general-purpose callee-saved register, but provide a platform-specific mechanism for external agents to reliably locate the chain of frame records
- It may elect not to maintain a frame chain and to use the frame pointer register as a general-purpose callee-saved register.
Note
Unlike the APCS and its variants, the same frame pointer register is used for both the Arm and Thumb ISAs (including the Thumb-1 variant), this ensures that the frame chain can be constructed even when generating code that interworks between both the Arm and Thumb instruction sets. It is expected that Thumb-1 code will rarely, if ever, want to create stack frames - the choice of a high register therefore ensures that such code can conform minimally to the requirements of having a valid value stored in the frame pointer register without noticably reducing the number of registers available to normal code.
The AAPCS does not specify where, within a function's stack frame record, the frame chain data structure resides. This permits implementors the freedom to use whatever location will result in the most efficient code needed to establish the frame chain record. As a result, even in Thumb-1, the overhead for establishing the frame will rarely exceed three additional instructions in the function entry sequence and two additional instructions in the return sequence.
Both the Arm and Thumb instruction sets contain a primitive subroutine call instruction, BL, which performs a branch-with-link operation. The effect of executing BL is to transfer the sequentially next value of the program counter – the return address – into the link register (LR) and the destination address into the program counter (PC). Bit 0 of the link register will be set to 1 if the BL instruction was executed from Thumb state, and to 0 if executed from Arm state. The result is to transfer control to the destination address, passing the return address in LR as an additional parameter to the called subroutine.
Control is returned to the instruction following the BL when the return address is loaded back into the PC (see Interworking).
A subroutine call can be synthesized by any instruction sequence that has the effect:
LR[31:1] ← return address
LR[0] ← code type at return address (0 Arm, 1 Thumb)
PC ← subroutine address
...
return address:
For example, in Arm-state, to call a subroutine addressed by r4 with control returning to the following instruction, do
MOV LR, PC
BX r4
...Note
The equivalent sequence will not work from Thumb state because the instruction that sets LR does not copy the Thumb-state bit to LR[0].
In Arm Architecture v5 both Arm and Thumb state provide a BLX instruction that will call a subroutine addressed by a register and correctly sets the return address to the sequentially next value of the program counter.
Both the Arm- and Thumb-state BL instructions are unable to address the full 32-bit address space, so it may be necessary for the linker to insert a veneer between the calling routine and the called subroutine. Veneers may also be needed to support Arm-Thumb inter-working or dynamic linking. Any veneer inserted must preserve the contents of all registers except IP (r12) and the condition code flags; a conforming program must assume that a veneer that alters IP may be inserted at any branch instruction that is exposed to a relocation that supports inter-working or long branches.
Note
R_ARM_CALL, R_ARM_JUMP24, R_ARM_PC24,
R_ARM_THM_CALL, R_ARM_THM_JUMP24 and
R_ARM_THM_JUMP19 are examples of the ELF relocation types with
this property. See AAELF32 for full details.
The manner in which a result is returned from a function is determined by the type of that result.
For the base standard:
- A Half-precision Floating Point Type is returned in the least significant 16 bits of r0.
- A Fundamental Data Type that is smaller than 4 bytes is zero- or sign-extended to a word and returned in r0.
- A word-sized Fundamental Data Type (e.g.,
int,float) is returned in r0. - A double-word sized Fundamental Data Type (e.g.,
long long,doubleand 64-bit containerized vectors) is returned in r0 and r1. - A 128-bit containerized vector is returned in r0-r3.
- A Composite Type not larger than 4 bytes is returned in r0. The format is as if the result had been stored in memory at a word-aligned address and then loaded into r0 with an LDR instruction. Any bits in r0 that lie outside the bounds of the result have unspecified values.
- A Composite Type larger than 4 bytes, or whose size cannot be determined statically by both caller and callee, is stored in memory at an address passed as an extra argument when the function was called (Parameter Passing (base PCS), Rule A.4). The memory to be used for the result may be modified at any point during the function call.
The base standard provides for passing arguments in core registers (r0-r3) and on the stack. For subroutines that take a small number of parameters, only registers are used, greatly reducing the overhead of a call.
Parameter passing is defined as a two-level conceptual model
- A mapping from a source language argument onto a machine type
- The marshalling of machine types to produce the final parameter list
The mapping from the source language onto the machine type is specific for each language and is described separately (the C and C++ language bindings are described in Arm C and C++ Language Mappings). The result is an ordered list of arguments that are to be passed to the subroutine.
In the following description there are assumed to be a number of co-processors available for passing and receiving arguments. The co-processor registers are divided into different classes. An argument may be a candidate for at most one co-processor register class. An argument that is suitable for allocation to a co-processor register is known as a Co-processor Register Candidate (CPRC).
In the base standard there are no arguments that are candidates for a co-processor register class.
A variadic function is always marshaled as for the base standard.
For a caller, sufficient stack space to hold stacked arguments is assumed to have been allocated prior to marshaling: in practice the amount of stack space required cannot be known until after the argument marshalling has been completed. A callee can modify any stack space used for receiving parameter values from the caller.
When a Composite Type argument is assigned to core registers (either fully or partially), the behavior is as if the argument had been stored to memory at a word-aligned (4-byte) address and then loaded into consecutive registers using a suitable load-multiple instruction.
Stage A -– Initialization
This stage is performed exactly once, before processing of the arguments commences.
A.1 |
The Next Core Register Number (NCRN) is set to r0. |
A.2.cp |
Co-processor argument register initialization is performed. |
A.3 |
The next stacked argument address (NSAA) is set to the current stack-pointer value (SP). |
A.4 |
If the subroutine is a function that returns a result in memory, then the address for the result is placed in r0 and the NCRN is set to r1. |
Stage B – Pre-padding and extension of arguments
For each argument in the list the first matching rule from the following list is applied.
B.1 |
If the argument is a Composite Type whose size cannot be statically determined by both the caller and callee, the argument is copied to memory and the argument is replaced by a pointer to the copy. |
B.2 |
If the argument is an integral Fundamental Data Type that is smaller than a word, then it is zero- or sign-extended to a full word and its size is set to 4 bytes. If the argument is a Half-precision Floating Point Type its size is set to 4 bytes as if it had been copied to the least significant bits of a 32-bit register and the remaining bits filled with unspecified values. |
B.3.cp |
If the argument is a CPRC then any preparation rules for that co-processor register class are applied. |
B.4 |
If the argument is a Composite Type whose size is not a multiple of 4 bytes, then its size is rounded up to the nearest multiple of 4. |
B.5 |
If the argument is an alignment adjusted type its value is passed as a copy of the actual value. The copy will have an alignment defined as follows.
The alignment of the copy is used for applying marshaling rules. |
Stage C – Assignment of arguments to registers and stack
For each argument in the list the following rules are applied in turn until the argument has been allocated.
C.1.cp |
If the argument is a CPRC and there are sufficient unallocated co-processor registers of the appropriate class, the argument is allocated to co-processor registers. |
C.2.cp |
If the argument is a CPRC then any co-processor registers in that class that are unallocated are marked as unavailable. The NSAA is adjusted upwards until it is correctly aligned for the argument and the argument is copied to the memory at the adjusted NSAA. The NSAA is further incremented by the size of the argument. The argument has now been allocated. |
C.3 |
If the argument requires double-word alignment (8-byte), the NCRN is rounded up to the next even register number. |
C.4 |
If the size in words of the argument is not more than r4 minus NCRN, the argument is copied into core registers, starting at the NCRN. The NCRN is incremented by the number of registers used. Successive registers hold the parts of the argument they would hold if its value were loaded into those registers from memory using an LDM instruction. The argument has now been allocated. |
C.5 |
If the NCRN is less than r4 and the NSAA is equal to the SP, the argument is split between core registers and the stack. The first part of the argument is copied into the core registers starting at the NCRN up to and including r3. The remainder of the argument is copied onto the stack, starting at the NSAA. The NCRN is set to r4 and the NSAA is incremented by the size of the argument minus the amount passed in registers. The argument has now been allocated. |
C.6 |
The NCRN is set to r4. |
C.7 |
If the argument required double-word alignment (8-byte), then the NSAA is rounded up to the next double-word address. |
C.8 |
The argument is copied to memory at the NSAA. The NSAA is incremented by the size of the argument. |
It should be noted that the above algorithm makes provision for languages other than C and C++ in that it provides for passing arrays by value and for passing arguments of dynamic size. The rules are defined in a way that allows the caller to be always able to statically determine the amount of stack space that must be allocated for arguments that are not passed in registers, even if the function is variadic.
Several further observations can also be made:
- The initial stack slot address is the value of the stack pointer that will be passed to the subroutine. It may therefore be necessary to run through the above algorithm twice during compilation, once to determine the amount of stack space required for arguments and a second time to assign final stack slot addresses.
- A double-word aligned type will always start in an even-numbered core register, or at a double-word aligned address on the stack even if it is not the first member of an aggregate.
- Arguments are allocated first to registers and only excess arguments are placed on the stack.
- Arguments that are Fundamental Data Types can either be entirely in registers or entirely on the stack.
- At most one argument can be split between registers and memory according to Rule C.5.
- CPRCs may be allocated to co-processor registers or the stack – they may never be allocated to core registers.
- Since an argument may be a candidate for at most one class of co-processor register, then the rules for multiple co-processors (should they be present) may be applied in any order without affecting the behavior.
- An argument may only be split between core registers and the stack if all preceding CPRCs have been allocated to co-processor registers.
The AAPCS requires that all sub-routine call and return sequences support inter-working between Arm and Thumb states. The implications on compiling for various Arm Architectures are as follows.
Arm v5 and Arm v6
Calls via function pointers should use one of the following, as appropriate:
blx Rm ; For normal sub-routine callsbx Rm ; For tail callsCalls to functions that use bl<cond>, b, or b<cond>
will need a linker-generated veneer if a state change is required, so it may
sometimes be more efficient to use a sequence that permits use of an
unconditional bl instruction.
Return sequences may use load-multiple operations that directly load the PC
or a suitable bx instruction.
The following traditional return must not be used if inter-working might be required.
mov pc, RmArm v4T
In addition to the constraints for Arm v5, the following additional restrictions apply to Arm v4T.
Calls using bl that involve a state change also require a
linker-generated stub.
Calls via function pointers must use a sequence equivalent to the Arm-state code
mov lr, pc
bx RmHowever, this sequence does not work for Thumb state, so usually a
bl to a veneer that does the bx instruction must be used.
Return sequences must restore any saved registers and then use a bx
instruction to return to the caller.
Arm v4
The Arm v4 Architecture supports neither Thumb state nor the bx
instruction, therefore it is not strictly compatible with the AAPCS.
It is recommended that code for Arm v4 be compiled using Arm v4T
inter-working sequences but with all bx instructions subject to
relocation by an R_ARM_V4BX relocation [AAELF32]. A
linker linking for Arm V4 can then change all instances of:
bx RmInto:
mov pc, RmBut relocatable files remain compatible with this standard.
This section applies only to non-variadic functions. For a variadic function the base standard is always used both for argument passing and result return.
This variant alters the manner in which floating-point values are passed between a subroutine and its caller and allows significantly better performance when a VFP co-processor, the Advanced SIMD Extension or the M-profile Vector Extension is present.
Values passed across a procedure call interface in VFP registers are laid out as follows:
- A half precision floating point type is passed as if it were loaded from its memory format into the least significant 16 bits of a single precision register.
- A single precision floating point type is passed as if it were loaded
from its memory format into a single precision register with
VLDR. - A double precision floating point type is passed as if it were loaded
from its memory format into a double precision register with
VLDR. - A 64-bit containerized vector type is passed as if it were loaded from
its memory format into a 64-bit vector register (Dn) with
VLDR. - A 128-bit containerized vector type is passed as if it were loaded from
its memory format into a 128-bit vector register (Qn) with
a single
VLDMof the two component 64-bit vector registers (for example,VLDM r0,{d2,d3}would load q1).
The set of call saved registers is the same as for the base standard (VFP register usage conventions).
For the VFP the following argument types are VFP CPRCs.
- A half-precision floating-point type.
- A single-precision floating-point type.
- A double-precision floating-point type.
- A 64-bit or 128-bit containerized vector type.
- A Homogeneous Aggregate with a Base Type of a single- or double-precision floating-point type with one to four Elements.
- A Homogeneous Aggregate with a Base Type of 64-bit containerized vectors with one to four Elements.
- A Homogeneous Aggregate with a Base Type of 128-bit containerized vectors with one to four Elements.
Note
There are no VFP CPRCs in a variadic procedure.
Any result whose type would satisfy the conditions for a VFP CPRC is returned in the appropriate number of consecutive VFP registers starting with the lowest numbered register (s0, d0, q0).
All other types are returned as for the base standard.
There is one VFP co-processor register class using registers s0-s15 (d0-d7) for passing arguments.
The following co-processor rules are defined for the VFP:
| A.2.vfp | The floating point argument registers are marked as unallocated. |
| B.3.vfp | Nothing to do. |
| C.1.vfp | If the argument is a VFP CPRC and there are sufficient consecutive VFP registers of the appropriate type unallocated then the argument is allocated to the lowest-numbered sequence of such registers. |
| C.2.vfp | If the argument is a VFP CPRC then any VFP registers that are unallocated are marked as unavailable. The NSAA is rounded up to the next multiple of 4 if the natural alignment of the argument is ≤ 4 or the next multiple of 8 if its natural alignment is ≥ 8 and the argument is copied to the stack at the adjusted NSAA. The NSAA is further incremented by the size of the argument. The argument has now been allocated. |
Note that the rules require the ‘back-filling’ of unused co-processor registers that are skipped by the alignment constraints of earlier arguments. The back-filling continues only so long as no VFP CPRC has been allocated to a slot on the stack.
Code may be compiled to use the Arm Alternative format Half-precision values. The rules for passing and returning values will either use the Base Standard rules or the VFP and SIMD vector register rules.
Code compiled or assembled for execution environments that require read-write position independence (for example, the single address-space DLL-like model) use a static base to address writable data. Core register r9 is renamed as SB and used to hold the static base address: consequently this register may not be used for holding other values at any time [5].
The variants described in The Standard Variants can produce code that is incompatible with the base standard. Nevertheless, there still exist subsets of code that may be compatible across more than one variant. This section describes the theoretical levels of compatibility between the variants; however, whether a tool-chain must accept compatible objects compiled to different base standards, or correctly reject incompatible objects, is implementation defined.
Code compiled for the VFP calling standard is compatible with the base standard (and vice-versa) if no floating-point or containerized vector arguments or results are used, or if the only routines that pass or return such values are variadic routines.
Code compiled for the base standard is compatible with the RWPI calling standard if it makes no use of register r9. However, a platform ABI may restrict further the subset of code that is usefully compatible.
The VFP calling variant and RWPI addressing variant may be combined to create a third major variant. The appropriate combination of the rules described above will determine whether code is compatible.
The set of values that can be represented in Arm Alternative format differs from the set that can be represented in IEEE754-2008 format rendering code built to use either format incompatible with code that uses the other. However, most code will make no use of either format and will therefore be compatible with both variants.
This section describes how Arm compilers map C language features onto the machine-level standard. To the extent that C++ is a superset of the C language it also describes the mapping of C++ language features.
The mapping of C arithmetic types to Fundamental Data Types is shown in the following table.
| C/C++ Type | Machine Type | Notes |
|---|---|---|
char |
unsigned byte | LDRB is unsigned |
unsigned char |
unsigned byte | |
signed char |
signed byte | |
[signed] short |
signed halfword | |
unsigned short |
unsigned halfword | |
[signed] int |
signed word | |
unsigned int |
unsigned word | |
[signed] long |
signed word | |
unsigned long |
unsigned word | |
[signed] long long |
signed double-word | C99 Only |
unsigned long long |
unsigned double-word | C99 Only |
__fp16 |
half precision (IEEE754-2008 or Arm Alternative) | Arm extension documented in [ACLE]. In a variadic function call this will be passed as a double-precision value. |
__bf16 |
half precision Brain floating-point format | Arm extension documented in [ACLE]. |
float |
single precision (IEEE 754) | |
double |
double precision (IEEE 754) | |
long double |
double precision (IEEE 754) | |
float _Imaginary |
single precision (IEEE 754) | C99 Only |
double _Imaginary |
double precision (IEEE 754) | C99 Only |
long double _Imaginary |
double precision (IEEE 754) | C99 Only |
float _Complex |
2 single precision (IEEE 754) | C99 Only. Layout is struct { float re;
float im; }; |
double _Complex |
2 double precision (IEEE 754) | C99 Only. Layout is struct { double re;
double im; }; |
long double _Complex |
2 double precision (IEEE 754) | C99 Only. Layout is struct { long double re;
long double im; }; |
_Bool/bool |
unsigned byte | C99/C++ Only. False has value 0 and True has value 1. |
wchar_t |
see text | built-in in C++, typedef in C, type is platform specific |
The preferred type of wchar_t is unsigned int. However, a virtual
platform may elect to use unsigned short instead. A platform standard
must document its choice.
The container types for pointer types are shown in the following table. A C++ reference type is implemented as a pointer to the type.
| Pointer Type | Machine Type | Notes |
|---|---|---|
T* |
data pointer | any data type T |
T (*F)() |
code pointer | any function type F |
T& |
data pointer | C++ reference |
This ABI delegates a choice of representation of enumerated types to a platform ABI (whether defined by a standard or by custom and practice) or to an interface contract if there is no defined platform ABI.
The two permitted ABI variants are:
- An enumerated type normally occupies a word (
intorunsigned int). If a word cannot represent all of its enumerated values the type occupies a double word (long longorunsigned long long). - The type of the storage container for an enumerated type is the smallest integer type that can contain all of its enumerated values.
When both the signed and unsigned versions of an integer type can represent all values, this ABI recommends that the unsigned type should be preferred (in line with common practice).
Discussion
The definition of enumerated types in the C and C++ language standards does not define a binary interface and leaves open the following questions.
- Does the container for an enumerated type have a fixed size (as expected in most OS environments) or is the size no larger than needed to hold the values of the enumeration (as expected by most embedded users)?
- What happens when a (strictly, non-conforming) enumerated value (e.g.
MAXINT+1) overflows a fixed-size (e.g.
int) container? - Is a value of enumerated type (after any conversion required by C/C++) signed or unsigned?
In relation to the last question the C and C++ language standards state:
- [C] Each enumerated type shall be compatible with an integer type. The choice of type is implementation-defined, but shall be capable of representing the values of all the members of the enumeration.
- [C++] An enumerated type is not an integral type but
... An rvalue of... enumeration type (7.2) can be converted to an rvalue
of the first of the following types that can represent all the values of
its underlying type:
int,unsigned int,long, orunsigned long.
Under this ABI, these statements allow a header file that describes the
interface to a portable binary package to force its clients, in a portable,
strictly-conforming manner, to adopt a 32-bit signed (int/long)
representation of values of enumerated type (by defining a negative
enumerator, a positive one, and ensuring the range of enumerators spans more
than 16 bits but not more than 32).
Otherwise, a common interpretation of the binary representation must be established by appealing to a platform ABI or a separate interface contract.
Both C and C++ require that a system provide additional type definitions
that are defined in terms of the base types. Normally these types are
defined by inclusion of the appropriate header file. However, in C++ the
underlying type of size_t can be exposed without the use of any header
files simply by using ::operator new(), and the definition of
va_list has implications for the internal implementation in the compiler.
An AAPCS conforming object must use the definitions shown in the following table.
| Typedef | Base type | Notes |
size_t |
unsigned int |
For consistent C++ mangling of ::operator new() |
va_list |
struct __va_list {
void *__ap;
} |
A va_list may address any object in a parameter
list. Consequently, the first object addressed may
only have word alignment (all objects are at least word
aligned), but any double-word aligned object will
appear at the correct double-word alignment in memory.
In C++, __va_list is in namespace std. |
A data type declaration may be qualified with the volatile type
qualifier. The compiler may not remove any access to a volatile data type
unless it can prove that the code containing the access will never be
executed; however, a compiler may ignore a volatile qualification of an
automatic variable whose address is never taken unless the function calls
setjmp(). A volatile qualification on a structure or union shall be
interpreted as applying the qualification recursively to each of the
fundamental data types of which it is composed. Access to a
volatile-qualified fundamental data type must always be made by accessing
the whole type.
The behavior of assigning to or from an entire structure or union that contains volatile-qualified members is undefined. Likewise, the behavior is undefined if a cast is used to change either the qualification or the size of the type.
Not all Arm architectures provide for access to types of all widths; for example, prior to Arm Architecture 4 there were no instructions to access a 16-bit quantity, and similar issues apply to accessing 64-bit quantities. Further, the memory system underlying the processor may have a restricted bus width to some or all of memory. The only guarantee applying to volatile types in these circumstances are that each byte of the type shall be accessed exactly once for each access mandated above, and that any bytes containing volatile data that lie outside the type shall not be accessed. Nevertheless, if the compiler has an instruction available that will access the type exactly it should use it in preference to smaller or larger accesses.
Structures and unions are laid out according to the Fundamental Data Types of which they are composed (see Composite Types). All members are laid out in declaration order. Additional rules applying to C++ non-POD class layout are described in CPPABI32 and GCPPABI.
A bit-field may have any integral type (including enumerated and bool types).
A sequence of bit-fields is laid out in the order declared using the rules below.
For each bit-field, the type of its container is:
- Its declared type if its size is no larger than the size of its declared type.
- The largest integral type no larger than its size if its size is larger than the size of its declared type (see Over-sized bit-fields).
The container type contributes to the alignment of the containing aggregate in the same way a plain (not bit-field) member of that type would, without exception for zero-sized or anonymous bit-fields.
Note
The C++ standard states that an anonymous bit-field is not a member, so it is unclear whether or not an anonymous bit-field of non-zero size should contribute to an aggregate’s alignment. Under this ABI it does.
The content of each bit-field is contained by exactly one instance of its container type.
Initially, we define the layout of fields that are no bigger than their container types.
Let F be a bit-field whose address we wish to determine. We define
the container address, CA(F), to be the byte address
CA(F) = &(container(F));
This address will always be at the natural alignment of the container type, that is
CA(F) % sizeof(container(F)) == 0.
The bit-offset of F within the container, K(F), is defined in
an endian-dependent manner:
- For big-endian data types
K(F)is the offset from the most significant bit of the container to the most significant bit of the bit-field. - For little-endian data types
K(F)is the offset from the least significant bit of the container to the least significant bit of the bit-field.
A bit-field can be extracted by loading its container, shifting and masking
by amounts that depend on the byte order, K(F), the container size,
and the field width, then sign extending if needed.
The bit-address of F, BA(F), can now be defined as
BA(F) = CA(F) * 8 + K(F)
For a bit address BA falling in a container of width C and
alignment A (≤ C) (both expressed in bits), define the
unallocated container bits (UCB) to be
UCB(BA, C, A) = C - (BA % A)
We further define the truncation function
TRUNCATE(X,Y) = Y * floor(X/Y)
That is, the largest integral multiple of Y that is no larger than
X.
We can now define the next container bit address (NCBA) which will be
used when there is insufficient space in the current container to hold the next
bit-field as
NCBA(BA, A) = TRUNCATE(BA + A - 1, A)
At each stage in the laying out of a sequence of bit-fields there is:
- A current bit address (
CBA) - A container size,
C, and alignment,A, determined by the type of the field about to be laid out (8, 16, 32, ...) - A field width,
W(≤C).
For each bit-field, F, in declaration order the layout is determined
by
- If the field width,
W, is zero, setCBA = NCBA(CBA, A) - If
W > UCB(CBA, C, A), setCBA = NCBA(CBA, A) - Assign
BA(F) = CBA - Set
CBA = CBA + W.
Note
The AAPCS does not allow exported interfaces to contain packed structures
or bit-fields. However a scheme for laying out packed bit-fields can be
achieved by reducing the alignment, A, in the above rules to below
that of the natural container type. ARMCC uses an alignment of
A=8 in these cases, but GCC uses an alignment of A=1.
To access a field, F, of width W and container width C
at the bit-address BA(F):
- Load the (naturally aligned) container at byte address
TRUNCATE(BA(F), C) / 8into a registerR(or two registers if the container is 64-bits) - Set
Q = MAX(32, C) - Little-endian, set
R = (R << ((Q - W) - (BA MOD C))) >> (Q - W). - Big-endian, set
R = (R << (BA MOD C)) >> (Q - W).
The long long bit-fields use shifting operations on 64-bit quantities; it may often be the case that these expressions can be simplified to use operations on a single 32-bit quantity (but see Volatile bit-fields – preserving number and width of container accesses).
C++ permits the width specification of a bit-field to exceed the container
size and the rules for allocation are given in [GCPPABI]. Using the
notation described above, the allocation of an over-sized bit-field of width
W, for a container of width C and alignment A is
achieved by:
- Selecting a new container width
C'which is the width of the fundamental integer data type with the largest size less than or equal toW. The alignment of this container will beA'. Note thatC' ≥ CandA' ≥ A. - If
C' > UCB(CBA, C', A')settingCBA = NCBA(CBA, A'). This ensures that the bit-field will be placed at the start of the next container type. - Allocating a normal (undersized) bit-field using the values (
C,C',A') for (W,C,A). - Setting
CBA = CBA + W - C.
Note
Although standard C++ does not have a long long data type, this is a
common extension to the language. To avoid the presence of this type
changing the layout of oversized bit-fields the above rules are described
in terms of the fundamental machine types (Fundamental Data Types)
where a 64-bit integer data type always exists.
An oversized bit-field can be accessed simply by accessing its container type.
A bit-field container may overlap a non-bit-field member. For the purposes
of determining the layout of bit-field members the CBA will be the
address of the first unallocated bit after the preceding non-bit-field type.
Note
Any tail-padding added to a structure that immediately precedes a
bit-field member is part of the structure and must be taken into account
when determining the CBA.
When a non-bit-field member follows a bit-field it is placed at the lowest acceptable address following the allocated bit-field.
Note
When laying out fundamental data types it is possible to consider them all to be bit-fields with a width equal to the container size. The rules in Bit-fields no larger than their container can then be applied to determine the precise address within a structure.
When a volatile bit-field is read, and its container does not overlap with any non-bit-field member or any zero length bit-field member, its container must be read exactly once using the access width appropriate to the type of the container.
When a volatile bit-field is written, and its container does not overlap with any non-bit-field member or any zero length bit-field member, its container must be read exactly once and written exactly once using the access width appropriate to the type of the container. The two accesses are not atomic.
Note
This ABI does not place any restrictions on the access widths of bit-fields
where the container overlaps with a non-bit-field member or where the container
overlaps with any zero length bit-field placed between two other bit-fields. This
is because the C/C++ memory model defines these as being separate memory locations,
which can be accessed by two threads simultaneously. For this reason, compilers
must be permitted to use a narrower memory access width (including splitting
the access into multiple instructions) to avoid writing to a different memory
location. For example, in struct S { int a:24; char b; }; a write to
a must not also write to the location occupied by b, this
requires at least two memory accesses in all current Arm architectures.
In the same way, in struct S { int a:24; int:0; int b:8; };, writes to
a or b must not overwrite each other.
Multiple accesses to the same volatile bit-field, or to additional volatile bit-fields within the same container may not be merged. For example, an increment of a volatile bit-field must always be implemented as two reads and a write.
Note
Note the volatile access rules apply even when the width and alignment of the bit-field imply that the access could be achieved more efficiently using a narrower type. For a write operation the read must always occur even if the entire contents of the container will be replaced.
If the containers of two volatile bit-fields overlap then access to one
bit-field will cause an access to the other. For example, in struct S
{volatile int a:8; volatile char b:2}; an access to a will also
cause an access to b, but not vice-versa.
If the container of a non-volatile bit-field overlaps a volatile bit-field then it is undefined whether access to the non-volatile field will cause the volatile field to be accessed.
The argument list for a subroutine call is formed by taking the user arguments in the order in which they are specified.
- For C, each argument is formed from the value specified in the source code, except that an array is passed by passing the address of its first element.
- For C++, an implicit
thisparameter is passed as an extra argument that immediately precedes the first user argument. Other rules for marshalling C++ arguments are described in CPPABI32. - For variadic functions,
floatarguments that match the ellipsis (...) are converted to typedouble.
The argument list is then processed according to the standard rules for procedure calls (see Parameter Passing (base PCS)) or the appropriate variant.
The Advanced SIMD and M-profile Vector Extension to the Arm architecture add support for processing short vectors. Because the C and C++ languages do not provide standard types to represent these vectors, access to them is provided by a vendor extension. The status of this appendix is normative in respect of public binary interfaces, i.e. the calling convention and name mangling of functions which use these types. In other respects it is informative.
Access to the SIMD vector data types is obtained by including either of the two
following header files: arm_neon.h, arm_mve.h. These headers
provide the following features:
- They provide a set of user-level type names that map onto short vector types
- They provide prototypes for intrinsic functions that map onto the Advanced SIMD and M-profile Vector Extension(MVE) intruction sets respectively.
Note
The intrinsic functions are beyond the scope of this specification. Details of the usage of the user-level types (e.g. initialization, and automatic conversions) are also beyond the scope of this specification. For further details see [ACLE].
Note
The user-level types are listed in Advanced SIMD Extension only vector data
types using 64-bit containerized vectors and SIMD vector data types using
128-bit containerized vectors. The types have 64-bit alignment and map
directly onto the containerized vector fundamental data types. The memory
format of the containerized vector is defined as loading the specified
registers from an array of the Base Type using the Fill Operation and then
storing that value to memory using a single VSTM of the loaded
64-bit (D) registers.
MVE only allows 128-bit vector types and it uses unsigned integer vectors to represent polynomials.
The tables also list equivalent structure types to be used for name mangling. Whether these types are actually defined by an implementation is unspecified.
| User type name | Equivalent type name for mangling | Elements | Base type | Fill operation |
|---|---|---|---|---|
int8x8_t |
struct __simd64_int8_t |
8 | signed byte | VLD1.8 {Dn}, [Rn] |
int16x4_t |
struct __simd64_int16_t |
4 | signed half word | VLD1.16 {Dn}, [Rn] |
int32x2_t |
struct __simd64_int32_t |
2 | signed word | VLD1.32 {Dn}, [Rn] |
int64x1_t |
struct __simd64_int64_t |
1 | signed double word | VLD1.64 {Dn}, [Rn] |
uint8x8_t |
struct __simd64_uint8_t |
8 | unsigned byte | VLD1.8 {Dn}, [Rn] |
uint16x4_t |
struct __simd64_uint16_t |
4 | unsigned half word | VLD1.16 {Dn}, [Rn] |
uint32x2_t |
struct __simd64_uint32_t |
2 | unsigned word | VLD1.32 {Dn}, [Rn] |
uint64x1_t |
struct __simd64_uint64_t |
1 | unsigned double word | VLD1.64 {Dn}, [Rn] |
float16x4_t |
struct __simd64_float16_t |
4 | half precision float | VLD1.16 {Dn}, [Rn] |
float32x2_t |
struct __simd64_float32_t |
2 | single precision float | VLD1.32 {Dn}, [Rn] |
poly8x8_t |
struct __simd64_poly8_t |
8 | 8-bit polynomial over GF(2) | VLD1.8 {Dn}, [Rn] |
poly16x4_t |
struct __simd64_poly16_t |
4 | 16-bit polynomial over GF(2) | VLD1.16 {Dn}, [Rn] |
| User type name | Equivalent type name for mangling | Elements | Base type | Fill operation |
|---|---|---|---|---|
int8x16_t |
struct __simd128_int8_t |
16 | signed byte | VLD1.8 {Qn}, [Rn] |
int16x8_t |
struct __simd128_int16_t |
8 | signed half word | VLD1.16 {Qn}, [Rn] |
int32x4_t |
struct __simd128_int32_t |
4 | signed word | VLD1.32 {Qn}, [Rn] |
int64x2_t |
struct __simd128_int64_t |
2 | signed double word | VLD1.64 {Qn}, [Rn] |
uint8x16_t |
struct __simd128_uint8_t |
16 | unsigned byte | VLD1.8 {Qn}, [Rn] |
uint16x8_t |
struct __simd128_uint16_t |
8 | unsigned half word | VLD1.16 {Qn}, [Rn] |
uint32x4_t |
struct __simd128_uint32_t |
4 | unsigned word | VLD1.32 {Qn}, [Rn] |
uint64x2_t |
struct __simd128_uint64_t |
2 | unsigned double word | VLD1.64 {Qn}, [Rn] |
float32x4_t |
struct __simd128_float32_t |
4 | single precision float | VLD1.32 {Qn}, [Rn] |
poly8x16_t |
struct __simd128_poly8_t |
16 | 8-bit polynomial over GF(2) | VLD1.8 {Qn}, [Rn] |
poly16x8_t |
struct __simd128_poly16_t |
8 | 16-bit polynomial over GF(2) | VLD1.16 {Qn}, [Rn] |
poly64x2_t |
struct __simd128_poly64_t |
2 | 64-bit polynomial over GF(2) | VLD1.64 {Qn}, [Rn] |
For C++ the mangled name for parameters is as though the equivalent type name was used. For example,
void f(int8x8_t)is mangled as
_Z1f15__simd64_int8_t
Footnotes
| [1] | This definition of conformance gives maximum freedom to implementers. For example, if it is known that both sides of an externally visible interface will be compiled by the same compiler, and that the interface will not be publicly visible, the AAPCS permits the use of private arrangements across the interface such as using additional argument registers or passing data in non-standard formats. Stack invariants must, nevertheless, be preserved because an AAPCS-conforming routine elsewhere in the call chain might otherwise fail. Rules for use of IP must be obeyed or a static linker might generate a non-functioning executable program. Conformance at a publicly visible interface does not depend on what happens behind that interface. Thus, for example, a tree of non-public, non-conforming calls can conform because the root of the tree offers a publicly visible, conforming interface and the other constraints are satisfied. |
| [2] | Data elements include: parameters to routines named in the interface, static data named in the interface, and all data addressed by pointer values passed across the interface. |
| [3] | The underlying hardware may not directly support a pure-endian view of data objects that are not naturally aligned. |
| [4] | The intent is to permit the C construct struct {int a:8; char b[7];}
to have size 8 and alignment 4. |
| [5] | Although not mandated by this standard, compilers usually formulate the address of a static datum by loading the offset of the datum from SB, and adding SB to it. Usually, the offset is a 32-bit value loaded PC-relative from a literal pool. Usually, the literal value is subject to R_ARM_SBREL32-type relocation at static link time. The offset of a datum from SB is clearly a property of the layout of an executable, which is fixed at static link time. It does not depend on where the data is loaded, which is captured by the value of SB at run time. |