docs/dev/infant.pod - Infant Mortality
This document compares and contrasts several proposals for Parrot's Garbage Collection system.
We have a garbage collector that needs to detect all dead objects (the process is called the mark phase of GC). Any Parrot operation that might allocate memory can potentially trigger a GC mark run (if not enough memory is available, we need to free up some unused objects to give us enough room to allocate our new object. But in order to know what can be freed up, we need to know what's alive, so we do a GC mark run.)
The GC mark run pass begins with a "root set" of objects that are known to be in use -- the PMC and String registers, the Parrot stack, the global symbol table, etc. Each of these objects is scanned for references to other objects, recursively. All objects found during this search are regarded as live. Everything else is considered dead and so is available for reclamation.
The question of what should be in the root set is problematic. Consider the case where you've created a PMC. If you immediately stuff it into a register, then you're all set. But what if you're putting it into an aggregate? If the aggregate isn't large enough, you'll need to resize it, which might allocate memory, which might trigger a GC mark run. And that run may free your freshly-created PMC.
In this case, the solution is simple: resize the array, if necessary, before creating the PMC. But many situations are not so simple, and the set of operations which could conceivably require more memory is vast. This problem is referred to as the "infant mortality" problem.
Peter Gibbs, Mike Lambert, Dan Sugalski and others have considered various solutions to this problem. Most of those solutions have been implemented in some form or other.
SOLUTION 1: STACK WALKING
One possible solution is to add the C stack into the root set. This way, temporary PMCs that have not yet been anchored to the root set will be found on the stack and treated as live. Actually, the C stack is insufficient -- you must also scan through all processor registers, and for some processors there may be a separate backing store for those registers (eg the Sparc's register windows). Uninitialized data on the stack and high alignment requirements for stackframes can fool the GC system with left over pointers from previous calls. This is especially a problem for objects which need early destruction.
+ No slowdown in the common case of no dead objects + Convenient: the programmer does not need to code differently to accommodate the garbage collection system. - Unportable. Different processors need different code for scanning their registers, stacks, register windows, etc. Also, on some architectures you must scan every possible offset into the stack to find all the pointers, while on others you must NOT scan every possible offset or you'll get a bus error due to a misaligned access. - Slow mark phase. A full stack walk takes quite a while, and this time grows with nested interpreter calls, external code's stack usage, etc. - Complex. The stack walk is necessarily conservative, in that it must consider every valid pointer on the stack to potentially be a traceable object. But some of those pointers may be stale, in which case the memory they point to may have been partially reused for some other purpose. Everything must operate within certain constraints that guarantee that no invalid pointers will be dereferenced and trigger a segmentation fault or bus error. - Another side effect of the conservative nature of stack walking is that the memory for these objects may never be returned to the system, because it is always possible that there will be a stale pointer lying around on the stack or in a register, and all such pointers will be dereferenced.
SOLUTION 2: NEONATE FLAG
There are several possible variants of the neonate flag, but the basic idea is to set a flag on newly created objects that prevents them from being collected. At some point, this flag is cleared -- either as the newborn object is anchored to the root set, or during the first mark pass after it was anchored, or explicitly when the object is no longer needed.
+ Portable + Can return memory to the system when unneeded + Exact: the state of every object is always known precisely (no more "this object MIGHT still be reachable") - The coder must remember to clear the flag before discarding unanchored objects - The flag-clearing takes a small amount of time - For some variants of this scheme, some time is consumed to clear the flag for the common case of rooted objects
Subspecies of neonate flags
The variants of the neonate idea all hinge on exactly how and when the flag is cleared.
Variant 1: explicit
The flag is always explicitly cleared by the coder.
+ Very simple + Fast mark phase - Slow for unanchored temporaries - Slow for anchored objects - Easy to forget to clear the flag for unanchored temporaries - Easy to forget to clear the flag for anchored objects - longjmp() can bypass the clearing
Variant 2: explicit for temporaries, cleared during anchoring
The flag is explicitly set for temporaries. All routines which anchor an object to the root set also clear the flag.
+ Simple + Fast mark phase - Slow for unanchored temporaries - Slow for anchored objects - Easy to forget to clear the flag for unanchored temporaries - Forces all anchoring operations to set the flag (so this disallows direct assignment into a PMC register, for example) - longjmp() can bypass the clearing
Variant 3: clear during mark phase
The neonate flag is cleared during the mark phase when an object is encountered during the recursive root set traversal. (Leopold Toetsch's trick of setting the live_FLAG during creation is equivalent to this variation, I think.)
+ Simple + Fast mark phase (GC already manipulates the flags) - If there are multiple mark runs before the object is anchored or dies, it will be prematurely freed
Variant 4: generation count
This is the same as variant 3, except a "generation count" is maintained in the interpreter so that the neonate flag is only cleared during a later generation. The generation is incremented only at major control points such between opcodes, so that there is no chance of unanchored temporaries.
+ Fast mark phase (GC already manipulates the flags) - Generation count must be maintained - Disallows recursive opcode calls (necessary for eg implementing vtable functions in pasm) - Can temporarily use more memory (dead objects accumulate during the current generation)
In order to allow recursive opcode calls, we could increment the generation count in more places and make sure nothing is left unanchored at those points, but that would gradually remove all advantages of this scheme and make it more difficult to call existing vtable functions (since you never know when they might start running pasm code.)
Variant 5: generation stack
Notice that when using a generational count, you really only need to test whether the current generation is _different_ from an object's creation generation (which eliminates wraparound problems, too.) So rather than testing against a single "current" generation, allow a stack of multiple "current" generations. An object encountered during the mark phase will have its neonate flag cleared only if it doesn't match any of the "current" generation ids. This check can be optimized using a conservative bit mask as a preliminary test.
+ Still faster mark phase than stackwalking, though slower than the other neonate variants - Generation count must be maintained - Generation stack must be maintained - Disallows longjmp()'ing out of recursive opcode calls - Can temporarily use more memory (dead objects accumulate during all current generations)
Variant 6: Generation based on stack depth
Another similar idea is to use a generational system, with the "current generation" as a value on the C stack, passed as an extra argument after the interpreter. If a function creates temporary objects it calls other functions with an increased generational count. During a mark run, any PMC with a generation less than the current generation is considered live. Any PMC with a generation greater than the current generation is considered free. This works through longjmps and recursive run_cores.
+ Simple + No stack-walking + Works through longjmps and recursive run_cores + No explicit setting and clearing of flags - Needs to change to change the signature of every Parrot function - Nested temporaries can survive if there is no mark run between two function calls with increased generation count
SOLUTION 3: EXPLICIT ROOT SET AUGMENTATION
Variant 1: Temporarily anchor objects
Provide a mechanism to temporarily anchor an otherwise unanchored object to the root set. (eg, have an array of objects associated with the interpreter that are all considered to be part of the root set.) This has pretty much the same advantages and disadvantages of explicit neonate flag setting:
+ Simple + Fast mark phase - Slow for unanchored temporaries - Sometimes slow for anchored objects (depending on whether they need to be temporarily anchored before the final anchoring) - Easy to forget to remove temporaries from the root set - Easy to double-anchor objects and forget to remove the temporary anchoring - longjmp() can bypass the unanchoring
Many of the same or similar variations also apply: objects could be automatically removed from the temporary anchoring at generation boundaries, etc.
Variant 2: Anchor early, anchor often
First place a new PMC in the root set (e.g. a register), then initialise it. If that's too cumbersome, disable GC; if that's suboptimal, use active anchoring to some root set linked list for temporary PMCs.
+ Simple + Fast mark phase (No stack-walking) - GC might be turned off for a long time (Maybe a recursive run_core is called) - Easy to forget to reenable GC - longjmp() can bypass reenabling of GC (this might be hidden in the wrapper functions as only one value needs to be restored)
Variant 3: Use a linked list of frames
The signature of every Parrot function is extended with an extra parameter which is a parameter to a frame structure. All temporary PMCs needs to put into such a frame structure. The first parameter of this frame structure is a link to the previously used frame structure. If a function that can do a mark run is called a pointer to the current frame is applied. The linked list of frames represents always an exact list of the active temporaries on the C-stack.
+ Fast mark runs (only the known PMC-pointers are walked) + Exact + works through recursive run_cores and longjmp() - signature of every Parrot function changes - Creation of temporaries is complicated (Need to create a frame first)
- What is neonate?
Brent Dax's better description of the problem than I have here
- Mike Lambert proposing Variant 1
This also has some macro-heavy proposals that I ignored.
- Leopold Toetsch proposing Variant 3
Also includes Steve Fink proposing Variant 1
- Dan Sugalski proposing Variant 3
- Peter Gibbs implementing Variant 4 and getting shot down
- General discussion kicked off by this document
This thread also includes Benjamin Goldberg Variant 6
- Dan thinks the stackwalk is unavoidable
- Infant mortality pain
This is a good thread for illustrating the pain that infant mortality causes -- in the context of Parrot, I mean.
Gives some benchmark numbers for different approaches.
- Generational stuff
Early discussion that has some stuff I didn't go over here. Mostly involves generational schemes.
- Problems with stack-walking
This thread also includes Juergen Boemmels Variant 3 of Solution 3
2002-Dec-30: Initial Version by Steve Fink 2003-Aug-04: Some extra variants added by Juergen Boemmels