EIP: 615
Title: Subroutines and Static Jumps for the EVM
Status: Draft
Type: Core
Author: Greg Colvin <[email protected]>, Paweł Bylica, Christian Reitwiessner
Created: 2016-12-10
Edited: 2017-25-4
This EIP introduces new EVM opcodes and conditions on EVM code to support subroutines and static jumps, disallow dynamic jumps, and thereby make EVM code amenable to linear-time static analysis. This will provide for better compilation, interpretation, transpilation, and formal analysis of EVM code.
All current implementations of the Ethereum Virtual Machine, including the just-in-time compilers, are much too slow. This proposal identifies a major reason for this and proposes changes to the EVM specification to address the problem.
In particular, it imposes restrictions on current EVM code and proposes new instructions to help provide for
- better-optimized compilation to native code
- faster interpretation
- faster transpilation to eWASM
- better compilation from other languages, including eWASM and Solidity
- better formal analysis tools
These goals are achieved by
- disallowing dynamic jumps
- introducing subroutines - jumps with return support
- disallowing pathological control flow and uses of the stack
We also propose to validate - in linear time - that EVM contracts correctly use subroutines, avoid misuse of the stack, and meet other safety conditions before placing them on the blockchain. Validated code precludes most runtime exceptions and the need to test for them. And well-behaved control flow and use of the stack makes life easier for interpreters, compilers, formal analysis, and other tools.
Currently the EVM supports dynamic jumps, where the address to jump to is an argument on the stack. These dynamic jumps obscure the structure of the code and thus mostly inhibit control- and data-flow analysis. This puts the quality and speed of optimized compilation fundamentally at odds. Further, since every jump can potentially be to any jump destination in the code, the number of possible paths through the code goes up as the product of the number of jumps by the number of destinations, as does the time complexity of static analysis. But absent dynamic jumps code can be statically analyzed in linear time.
Static analysis includes validation, and much of optimization, compilation, transpilation, and formal analysis; every part of the tool chain benefits when linear-time analysis is available. In particular, faster control-flow analysis means faster compilation of EVM code to native code, and better data-flow analysis can help the compiler and the interpreter better track the size of the values on the stack and use native 64- and 32-bit operations when possible. Also, conditions which are checked at validation time don’t have to be checked repeatedly at runtime.
Note that analyses of a contract’s bytecode before execution - such as optimizations performed before interpretation, JIT compilation, and on-the-fly machine code generation - must be efficient and linear-time. Otherwise, specially crafted contracts can be used as attack vectors against clients that use static analysis of EVM code before the creation or execution of contracts.
We propose to deprecate two existing instructions - JUMP and JUMPI. They take their argument on the stack, which means that unless the value is constant they can jump to any JUMPDEST. (In simple cases like PUSH 0 JUMP the value on the stack can be known to be constant, but in general it's difficult.) We must nonetheless continue to support them in old code.
Having deprecated JUMP and JUMPI, we propose new instructions to support their legitimate uses.
These forms
INSTRUCTION x,INSTRUCTION x, yINSTRUCTION n, x ...
name instructions with one, two, and two or more arguments, respectively. An instruction is represented in the bytecode as a single-byte opcode. The arguments are laid out as immediate data bytes following the opcode. The size and encoding of immediate data fields is open to change. In particular, easily-parsed variable-length encodings might prove useful for bytecode offsets - which are in practice small but in principle can be large.
The two most important uses of JUMP and JUMPI are static jumps and return jumps. Conditional and unconditional static jumps are the mainstay of control flow. Return jumps are implemented as a dynamic jump to a return address pushed on the stack. With the combination of a static jump and a dynamic return jump you can - and Solidity does - implement subroutines. The problem is that static analysis cannot tell the one place the return jump is going, so it must analyze every possibility.
Static jumps are provided by
JUMPTO jump_targetJUMPIF jump_targetwhich are the same asJUMPandJUMPIexcept that they jump to an immediatejump_target, given as four immediate bytes, rather than an address on the stack.
To support subroutines, BEGINSUB, JUMPSUB, and RETURNSUB are provided. Brief descriptions follow, and full semantics are given below.
-
BEGINSUB n_args, n_resultsmarks the single entry to a subroutine.n_argsitems are taken off of the stack at entry to, andn_resultsitems are placed on the stack at return from the subroutine.n_argsandn_resultsare given as one immediate byte each. The bytecode for a subroutine ends at the nextBEGINSUBinstruction (orBEGINDATA, below) or at the end of the bytecode. -
JUMPSUB jump_targetjumps to an immediate subroutine address, given as four immediate bytes. -
RETURNSUBreturns from the current subroutine to the instruction following the JUMPSUB that entered it.
These five simple instructions form the primitives of the proposal.
In order to validate subroutines, EVM bytecode must be sequentially scanned matching jumps to their destinations. Since creation code has to contain the runtime code as data, that code might not correctly validate in the creation context and also does not have to be validated prior to the execution of the creation code. Because of that, there needs to be a way to place data into the bytecode that will be skipped over and not validated. Such data will prove useful for other purposes as well.
BEGINDATAspecifies that all of the following bytes to the end of the bytecode are data, and not reachable code.
The primitive operations provide for static jumps. Dynamic jumps are also used for O(1) indirection: an address to jump to is selected to push on the stack and be jumped to. So we also propose two more instructions to provide for constrained indirection. We support these with vectors of JUMPDEST or BEGINSUB offsets stored inline, which can be selected with an index on the stack. That constrains validation to a specified subset of all possible destinations. The danger of quadratic blow up is avoided because it takes as much space to store the jump vectors as it does to code the worst case exploit.
Dynamic jumps to a JUMPDEST are used to implement O(1) jumptables, which are useful for dense switch statements, and are implemented as instructions similar to this one on most CPUs.
JUMPV n, jumpdest ...jumps to one of a vector ofnJUMPDESToffsets via a zero-based index on the stack. The vector is stored inline in the bytecode. If the index is greater than or equal ton - 1the last (default) offset is used.nis given as four immediate bytes, allJUMPDESToffsets as four immediate bytes each.
Dynamic jumps to a BEGINSUB are used to implement O(1) virtual functions and callbacks, which take just two pointer dereferences on most CPUs.
JUMPSUBV n, beginsub ...jumps to one of a vector ofnBEGINSUBoffsets via a zero-based index on the stack. The vector is stored inline in the bytecode, MSB-first. If the index is greater than or equal ton - 1the last (default) offset is used.nis given as four immediate bytes, thenoffsets as four immediate bytes each.
JUMPV and JUMPSUBV are not strictly necessary. They provide O(1) operations that can be replaced by O(n) or O(log n) EVM code using static jumps, but that code will be slower, larger and use more gas for things that can and should be fast, small, and cheap, and that are directly supported in WASM with br_table and call_indirect.
These operations provide convenient access to subroutine parameters and other variables at fixed stack offsets within a subroutine.
-
PUTLOCAL nPops the top value on the stack and copies it to local variablen. -
GETLOCAL nPushes the value of local variablenon the EVM stack.
Local variable n is FP[-n] as defined below.
Jumps to and returns from subroutines are described here in terms of
- the EVM data stack, (as defined in the Yellow Paper usually just called “the stack”,
- a return stack of
JUMPSUBandJUMPSUBVoffsets, and - a frame stack of frame pointers.
We will adopt the following conventions to describe the machine state:
- The program counter
PCis (as usual) the byte offset of the currently executing instruction. - The stack pointer
SPcorresponds to the number of items on the stack - the stack size. As a negative offset it addresses the current top of the stack of data values, where new items are pushed. - The frame pointer
FPis set toSP + n_argsat entry to the currently executing subroutine. - The stack items between the frame pointer and the current stack pointer are called the frame.
- The current number of items in the frame,
FP - SP, is the frame size.
Defining the frame pointer so as to include the arguments is unconventional, but better fits our stack semantics and simplifies the remainder of the proposal.
The frame pointer and return stacks are internal to the subroutine mechanism, and not directly accessible to the program. This is necessary to prevent the program from modifying its state in ways that could be invalid.
The first instruction of an array of EVM bytecode begins execution of a main routine with no arguments, SP and FP set to 0, and with one value on the return stack - code size - 1. (Executing the virtual byte of 0 after this offset causes an EVM to stop. Thus executing a RETURNSUB with no prior JUMPSUB or JUMBSUBV - that is, in the main routine - executes a STOP.)
Execution of a subroutine begins with JUMPSUB or JUMPSUBV, which
- push
PCon the return stack, - push
FPon the frame stack, thus suspending execution of the current subroutine, and - set
FPtoSP + n_args, and - set
PCto the specifiedBEGINSUBaddress, thus beginning execution of the new subroutine. (The main routine is not addressable byJUMPSUBinstructions.)
Execution of a subroutine is suspended during and resumed after execution of nested subroutines, and ends upon encountering a RETURNSUB, which
- sets
FPto the top of the virtual frame stack and pops the stack, and - sets
PCto top of the return stack and pops the stack - advances
PCto the next instruction thus resuming execution of the enclosing subroutine or main program. ASTOP orRETURN` also ends the execution of a subroutine.
We would like to consider EVM code valid if and only if no execution of the program can lead to an exceptional halting state. But we must and will validate code in linear time. So our validation does not consider the code’s data and computations, only its control flow and stack use. This means we will reject programs with invalid code paths, even if those paths cannot be executed at runtime. Most conditions can be validated, and will not need to be checked at runtime; the exceptions are sufficient gas and sufficient stack. So some false negatives and runtime checks are the price we pay for linear time validation.
Execution is as defined in the Yellow Paper - a sequence of changes in the EVM state. The conditions on valid code are preserved by state changes. At runtime, if execution of an instruction would violate a condition the execution is in an exceptional halting state. The yellow paper defines five such states.
1 Insufficient gas
2 More than 1024 stack items
3 Insufficient stack items
4 Invalid jump destination
5 Invalid instruction
We propose to expand and extend the Yellow Paper conditions to handle the new instructions we propose.
To handle the return stack we expand the conditions on stack size:
2a The size of the data stack does not exceed 1024.
2b The size of the return stack does not exceed 1024.
Given our more detailed description of the data stack we restate condition 3 - stack underflow - as
3
SPmust be less than or equal toFP
Since the various DUP and SWAP operations are formalized as taking items off the stack and putting them back on, this prevents DUP and SWAP from accessing data below the frame pointer, since taking too many items off of the stack would mean that SP is less than FP.
To handle the new jump instructions and subroutine boundaries we expand the conditions on jumps and jump destinations.
4a
JUMPTO,JUMPIF, andJUMPVaddress onlyJUMPDESTinstructions.
4b
JUMPSUBandJUMPSUBVaddress onlyBEGINSUBinstructions.
4c
JUMPinstructions do not address instructions outside of the subroutine they occur in.
We have two new conditions on execution to ensure consistent use of the stack by subroutines:
6 For
JUMPSUBandJUMPSUBVthe frame size is at least then_argsof theBEGINSUB(s) to jump to.
7 For
RETURNSUBthe frame size is equal to then_resultsof the enclosingBEGINSUB.
Finally, we have one condition that prevents pathological uses of the stack:
8 For every instruction in the code the frame size is constant.
In practice, we must test at runtime for conditions 1 and 2 - sufficient gas and sufficient stack. We don’t know how much gas there will be, we don’t know how deep a recursion may go, and analysis of stack depth even for non-recursive programs is non-trivial.
All of the remaining conditions we validate statically.
Validation comprises two tasks:
- Checking that jump destinations are correct and instructions valid.
- Checking that subroutines satisfy the conditions on control flow and stack use.
We sketch out these two validation functions in pseudo-C below. To simplify the presentation only the five primitives are handled (JUMPV and JUMPSUBV would just add more complexity to loop over their vectors), we assume helper functions for extracting instruction arguments from immediate data and managing the stack pointer and program counter, and some optimizations are forgone.
Validating that jumps are to valid addresses takes two sequential passes over the bytecode - one to build sets of jump destinations and subroutine entry points, another to check that addresses jumped to are in the appropriate sets.
bytecode[code_size] // contains EVM bytecode to validate
is_sub[code_size] // is there a BEGINSUB at PC?
is_dest[code_size] // is there a JUMPDEST at PC?
sub_for_pc[code_size] // which BEGINSUB is PC in?
bool validate_jumps(PC)
{
current_sub = PC
// build sets of BEGINSUBs and JUMPDESTs
for (PC = 0; instruction = bytecode[PC]; PC = advance_pc(PC))
{
if instruction is invalid
return false
if instruction is BEGINDATA
break
if instruction is BEGINSUB
is_sub[PC] = true
current_sub = PC
sub_for_pc[PC] = current_sub
if instruction is JUMPDEST
is_dest[PC] = true
sub_for_pc[PC] = current_sub
}
// check that targets are in subroutine
for (PC = 0; instruction = bytecode[PC]; PC = advance_pc(PC))
{
if instruction is BEGINDATA
break;
if instruction is BEGINSUB
current_sub = PC
if instruction is JUMPSUB
if is_sub[jump_target(PC)] is false
return false
if instruction is JUMPTO or JUMPIF
if is_dest[jump_target(PC)] is false
return false
if sub_for_pc[PC] is not current_sub
return false
}
return true
}
Note that code like this is already run by EVMs to check dynamic jumps, including building the jump destination set every time a contract is run, and doing a lookup in the jump destination set before every jump.
This function can be seen as a symbolic execution of a subroutine in the EVM code, where only the effect of the instructions on the state being validated is computed. Thus the structure of this function is very similar to an EVM interpreter. This function can also be seen as an acyclic traversal of the directed graph formed by taking instructions as vertexes and sequential and branching connections as edges, checking conditions along the way. The traversal is accomplished via recursion, and cycles are broken by returning when a vertex which has already been visited is reached. The time complexity of this traversal is O(n-vertices + n-edges)
The basic approach is to call validate_subroutine(i, 0, 0), for i equal to the first instruction in the EVM code through each BEGINDATA offset. validate_subroutine() traverses instructions sequentially, recursing when JUMP and JUMPI instructions are encountered. When a destination is reached that has been visited before it returns, thus breaking cycles. It returns true if the subroutine is valid, false otherwise.
bytecode[code_size] // contains EVM bytecode to validate
frame_size[code_size ] // is filled with -1
// we validate each subroutine individually, as if at top level
// * PC is the offset in the code to start validating at
// * return_pc is the top PC on return stack that RETURNSUB returns to
// * at top level FP = 0, so SP is both the frame size and the stack size
validate_subroutine(PC, return_pc, SP)
{
// traverse code sequentially, recurse for jumps
while true
{
instruction = bytecode[PC]
// if frame size set we have been here before
if frame_size[PC] >= 0
{
// check for constant frame size
if instruction is JUMPDEST
if SP != frame_size[PC]
return false
// return to break cycle
return true
}
frame_size[PC] = SP
// effect of instruction on stack
n_removed = removed_items(instructions)
n_added = added_items(instruction)
// check for stack underflow
if SP < n_removed
return false
// net effect of removing and adding stack items
SP -= n_removed
SP += n_added
// check for stack overflow
if SP > 1024
return false
if instruction is STOP, RETURN, SUICIDE or BEGINDATA
return true
// violates single entry
if instruction is BEGINSUB
return false
// return to top or from recursion to JUMPSUB
if instruction is RETURNSUB
break;
if instruction is JUMPSUB
{
// check for enough arguments
sub_pc = jump_target(PC)
if SP < n_args(sub_pc)
return false
return true
}
// reset PC to destination of jump
if instruction is JUMPTO
{
PC = jump_target(PC)
continue
}
// recurse to jump to code to validate
if instruction is JUMPIF
{
if not validate_subroutine(jump_target(PC), return_pc, SP)
return false
}
// advance PC according to instruction
PC = advance_pc(PC)
}
// check for right number of results
if SP != n_results(return_pc)
return false
return true
}
All of the instructions are O(1) with a small constant, requiring just a few machine operations each, whereas a JUMP or JUMPI must do an O(log n) binary search of an array of JUMPDEST offsets before every jump. With the cost of JUMPI being high and the cost of JUMP being mid, we suggest the cost of JUMPV and JUMPSUBV should be mid, JUMPSUB and JUMPIF should be low, andJUMPTO should be verylow. Measurement will tell.
We tentatively suggest the following opcodes:
0xB0 JUMPTO
0xB1 JUMPIF
0XB2 JUMPSUB
0xB4 JUMPSUBV
0xB5 BEGINSUB
0xB6 BEGINDATA
0xB8 RETURNSUB
0xB9 PUTLOCAL
0xBA GETLOCAL
These changes would need to be implemented in phases at decent intervals:
1 If this EIP is accepted, invalid code should be deprecated. Tools should stop generating invalid code, users should stop writing it, and clients should warn about loading it.
2 A later hard fork would require clients to place only valid code on the block chain. Note that despite the fork old EVM code will still need to be supported indefinitely.
If desired, the period of deprecation can be extended indefinitely by continuing to accept code not versioned as new - but without validation. That is, by delaying step 2. Since we must continue to run old code this is not technically difficult.
Implementation of this proposal need not be difficult, At the least, interpreters can simply be extended with the new opcodes and run unchanged otherwise. The new opcodes require only stacks for the frame pointers and return offsets and the few pushes, pops, and assignments described above. JIT code can use native calls. Further optimizations include minimizing runtime checks for exceptions and taking advantage of validated code wherever possible.