Position-independent code

In computing, position-independent code[1] (PIC[1]) or position-independent executable (PIE) is a body of machine code that, being placed somewhere in the primary memory, executes properly regardless of its absolute address. PIC is commonly used for shared libraries, so that the same library code can be loaded in a location in each program address space where it will not overlap any other uses of memory (for example, other shared libraries). PIC was also used on older computer systems lacking an MMU,[2] so that the operating system could keep applications away from each other even within the single address space of an MMU-less system.

Position-independent code can be executed at any memory address without modification. This differs from absolute code,[1] which must be loaded at a specific location to function correctly,[1] and load-time locatable (LTL) code,[1] in which a linker or program loader modifies a program before execution so it can be run only from a particular memory location.[1] Generating position-independent code is often the default behavior for compilers, but they may place restrictions on the use of some language features, such as disallowing use of absolute addresses (position-independent code has to use relative addressing). Instructions that refer directly to specific memory addresses sometimes execute faster, and replacing them with equivalent relative-addressing instructions may result in slightly slower execution, although modern processors make the difference practically negligible.[3]


In early computers such as the IBM 701[4] (April 29, 1952) and IBM System/360[5] (April 7, 1964), code was position-dependent: each program was built to be loaded into, and run from, a particular address. Where a multitasking operating system allowed multiple jobs to be run using separate programs at the same time, operations had to be scheduled such that no two concurrent jobs would run programs that required the same load addresses. For example, both a payroll program and an accounts receivable program built to run at address 32K could not both be run at the same time.

IBM DOS/360 (1966) did not have the ability to relocate programs during loading. Sometimes multiple versions of a program were maintained, each built for a different load address. A special class of programs, called self-relocating programs, were coded to relocate themselves after loading. IBM OS/360 (1966) relocated executable programs when they were loaded into memory. Only one copy of the program was required, but once loaded the program could not be moved.

By way of comparison, on early segmented systems such as Burroughs MCP on the Burroughs B5000 (1961) and Multics (1964), paging systems such as IBM TSS/360 (1967)[lower-alpha 1] or base and bounds[lower-alpha 2] systems such as GECOS on the GE 625 and EXEC on the UNIVAC 1107, code was inherently position-independent, since addresses in a program were relative to the current segment rather than absolute.

Position-independent code was developed to eliminate these restrictions for non-segmented systems. A position-independent program could be loaded at any address in memory.

The invention of dynamic address translation (the function provided by an MMU) originally reduced the need for position-independent code because every process could have its own independent address space (range of addresses). However, multiple simultaneous jobs using the same code created a waste of physical memory. If two jobs run entirely identical programs, dynamic address translation provides a solution by allowing the system simply to map two different jobs' address 32K to the same bytes of real memory, containing the single copy of the program.

Different programs may share common code. For example, the payroll program and the accounts receivable program may both contain an identical sort subroutine. A shared module (a shared library is a form of shared module) gets loaded once and mapped into the two address spaces.

Technical details

Procedure calls inside a shared library are typically made through small procedure linkage table stubs, which then call the definitive function. This notably allows a shared library to inherit certain function calls from previously loaded libraries rather than using its own versions.

Data references from position-independent code are usually made indirectly, through Global Offset Tables (GOTs), which store the addresses of all accessed global variables. There is one GOT per compilation unit or object module, and it is located at a fixed offset from the code (although this offset is not known until the library is linked). When a linker links modules to create a shared library, it merges the GOTs and sets the final offsets in code. It is not necessary to adjust the offsets when loading the shared library later.

Position independent functions accessing global data start by determining the absolute address of the GOT given their own current program counter value. This often takes the form of a fake function call in order to obtain the return value on stack (x86) or in a special register (PowerPC, SPARC, MIPS, probably at least some other RISC processors, ESA/390), which can then be stored in a predefined standard register. Some processor architectures, such as the Motorola 68000, Motorola 6809, WDC 65C816, Knuth's MMIX, ARM and x86-64 allow referencing data by offset from the program counter. This is specifically targeted at making position-independent code smaller, less register demanding and hence more efficient.

Windows DLLs

Dynamic-link libraries (DLLs) in Microsoft Windows use variant E8 of the CALL instruction (Call near, relative, displacement relative to next instruction). These instructions do not need to be fixed up when a DLL is loaded.

Some global variables (e.g. arrays of string literals, virtual function tables) are expected to contain an address of an object in data section resp. in code section of the dynamic library; therefore, the stored address in the global variable needs to be updated to reflect the address where the DLL was loaded to. The dynamic loader calculates the address referred to by a global variable and stores the value in such global variable; this triggers copy-on-write of a memory page containing such global variable. Pages with code and pages with global variables that do not contain pointers to code or global data remain shared between processes. This operation needs to be done in any OS that can load a dynamic library at arbitrary address.

In Windows Vista and later versions of Windows, the relocation of DLLs and executables is done by the kernel memory manager, which shares the relocated binaries across multiple processes. Images are always relocated from their preferred base addresses, achieving address space layout randomization (ASLR).[6]

Versions of Windows prior to Vista require system DLLs to be prelinked at non-conflicting fixed addresses at the link time in order to avoid runtime relocation of images. Runtime relocation in these older versions of Windows is performed by the DLL loader within the context of each process, and the resulting relocated portions of each image can no longer be shared between processes.

The handling of DLLs in Windows differs from the earlier OS/2 procedure from which it derives. OS/2 presents a third alternative and attempts to load DLLs that are not position-independent into a dedicated "shared arena" in memory, and maps them once they are loaded. All users of the DLL are able to use the same in-memory copy.


In Multics each procedure conceptually[lower-alpha 3] has a code segment and a linkage segment. The code segment contains only code and the linkage section serves as a template for a new linkage segment. Pointer register 4 (PR4) points to the linkage segment of the procedure. A call to a procedure saves PR4 in the stack before loading it with a pointer to the callee's linkage segment. The procedure call uses an indirect pointer pair[7] with a flag to cause a trap on the first call so that the dynamic linkage mechanism can add the new procedure and its linkage segment to the Known Segment Table (KST), construct a new linkage segment, put their segment numbers in the caller's linkage section and reset the flag in the indirect pointer pair.


In IBM S/360 Time Sharing System (TSS/360 and TSS/370) each procedure may have a read-only public CSECT and a writable private Prototype Section (PSECT). A caller loads a V-constant for the routine into General Register 15 (GR15) and copies an R-constant for the routine's PSECT into the 19th word of the save area pointed to be GR13.[8]

The Dynamic Loader[9] does not load program pages or resolve address constants until the first page fault.

Position-independent executables

Position-independent executables (PIE) are executable binaries made entirely from position-independent code. While some systems only run PIC executables, there are other reasons they are used. PIE binaries are used in some security-focused Linux distributions to allow PaX or Exec Shield to use address space layout randomization to prevent attackers from knowing where existing executable code is during a security attack using exploits that rely on knowing the offset of the executable code in the binary, such as return-to-libc attacks.

Apple's macOS and iOS fully support PIE executables as of versions 10.7 and 4.3, respectively; a warning is issued when non-PIE iOS executables are submitted for approval to Apple's App Store but there's no hard requirement yet and non-PIE applications are not rejected.[10][11]

OpenBSD has PIE enabled by default on most architectures since OpenBSD 5.3, released on 1 May 2013.[12] Support for PIE in statically linked binaries, such as the executables in /bin and /sbin directories, was added near the end of 2014.[13] Beginning with Fedora 23, Fedora maintainers decided to build packages with PIE enabled as the default.[14] Ubuntu 17.10 has PIE enabled by default across all architectures.[15] Gentoo's new profiles now support PIE by default.[16]

Android enabled support for PIEs in Jelly Bean[17] and removed non-PIE linker support in Lollipop.[18]

See also


  1. While TSS/360 supported shared PIC, that was not true of all paging systems
  2. But a separate copy of the code was loaded for each job.
  3. There are some technical deviations for performance reasons that are beyond the scope of this article.


  1. "Types of Object Code". iRMX 86 Application Loader Reference Manual (PDF). Intel. pp. 1–2, 1–3. Retrieved 2017-08-21. […] Absolute code, and an absolute object module, is code that has been processed by LOC86 to run only at a specific location in memory. The Loader loads an absolute object module only into the specific location the module must occupy. Position-independent code (commonly referred to as PIC) differs from absolute code in that PIC can be loaded into any memory location. The advantage of PIC over absolute code is that PIC does not require you to reserve a specific block of memory. When the Loader loads PIC, it obtains iRMX 86 memory segments from the pool of the calling task's job and loads the PIC into the segments. A restriction concerning PIC is that, as in the PL/M-86 COMPACT model of segmentation […], it can have only one code segment and one data segment, rather than letting the base addresses of these segments, and therefore the segments themselves, vary dynamically. This means that PIC programs are necessarily less than 64K bytes in length. PIC code can be produced by means of the BIND control of LINK86. Load-time locatable code (commonly referred to as LTL code) is the third form of object code. LTL code is similar to PIC in that LTL code can be loaded anywhere in memory. However, when loading LTL code, the Loader changes the base portion of pointers so that the pointers are independent of the initial contents of the registers in the microprocessor. Because of this fixup (adjustment of base addresses), LTL code can be used by tasks having more than one code segment or more than one data segment. This means that LTL programs may be more than 64K bytes in length. FORTRAN 86 and Pascal 86 automatically produce LTL code, even for short programs. LTL code can be produced by means of the BIND control of LINK86. […]
  2. Levine, John R. (October 1999). "Chapter 8: Loading and overlays". Linkers and Loaders. San Francisco: Morgan Kaufmann. pp. 170–171. ISBN 1-55860-496-0. Archived from the original on 2012-02-16.
  3. Gabert, Alexander (January 2004). "Position Independent Code internals". Hardened Gentoo. Retrieved 2009-12-03. […] direct non-PIC-aware addressing is always cheaper (read: faster) than PIC addressing. […]
  4. "701 Announced", IBM, April 29, 1952
  5. "System/360 Announcement", IBM, April 7, 1964
  6. "Advances in Memory Management for Windows". View.officeapps.live.com. Retrieved 2017-06-23.
  7. "Section 6 Virtual Address Formation", DPS/LEVEL 68 & DPS 8M MULTICS PROCESSOR MANUAL (PDF) (Rev. 1 ed.), Honeywell Information Systems Inc., 1982, pp. 6–21, AL39
  8. "Section 3: TSS for the: Svslcm Programmer". IBM Time Sharing System Concepts and Facilities (PDF) (Seventh ed.). April 1978. p. 61. GC28-2003-6.
  9. IBM System/360 Time Sharing System Dynamic Loader (PDF) (Fourth ed.). September 1971. GY28-2031-3.
  10. "iphone - Non-PIE Binary - The executable 'project name' is not a Position Independent Executable. - Stack Overflow". stackoverflow.com.
  11. "iOS Developer Library". apple.com.
  12. "OpenBSD 5.3 Release". 2013-05-01. Retrieved 2014-10-10.
  13. "Heads Up: Snapshot Upgrades for Static PIE". 2014-12-24. Retrieved 2014-12-24.
  14. "Changes/Harden All Packages - FedoraProject". fedoraproject.org.
  15. "Ubuntu Foundations Team - Weekly Newsletter, 2017-06-15". 2017-06-15. Retrieved 2017-06-17.
  16. "New 17.0 profiles in the Gentoo repository". 2017-11-30. Retrieved 2017-12-10.
  17. "Security Enhancements in Android 1.5 through 4.1  -  Android Open Source Project". Android Open Source Project.
  18. "Security Enhancements in Android 5.0  -  Android Open Source Project". Android Open Source Project.
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