1988-07-04 15:30:12 +00:00
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.\" Introduction
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.\"
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1994-06-24 11:31:16 +00:00
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.\" $Id$
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1988-07-04 15:30:12 +00:00
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.NH
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INTRODUCTION.
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.PP
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This document describes an EM interpreter which does extensive checking.
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The interpreter exists in two versions: the normal version with full checking
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and debugging facilities, and a fast stripped version that does interpretation
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only.
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This document assumes that the full version is used.
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.LP
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First the virtual EM machine embodied by the interpreter (called \fBint\fP) is
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described, followed by some remarks on performance.
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The second section gives some specific implementation decisions.
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Section three explains the usage of the built-in debugging tool.
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.LP
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Appendix A gives an overview of the various warnings \fBint\fP gives,
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with possible causes and solutions.
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Appendix B is a simple tutorial on the use of \fBint\fP.
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A separate manual page exists.
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.PP
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The document assumes a good understanding of what EM is and what
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the assembly code looks like [1].
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Notions like 'procedure descriptor', 'mini', 'shortie' etc. are not
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explained.
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In the sequel, any word in \fIthis font\fP refers to the name of a
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variable, constant, function or whatever, used in the source code under
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the same name.
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.LP
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To avoid confusion: \fBint\fP interprets EM machine language (e.out files),
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\fInot\fP the assembly language (.e files) and \fInot\fP the compact
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code (.k files).
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.NH 2
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The virtual EM machine.
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.PP
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The memory layout of the virtual EM machine represented by the interpreter
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differs in details from the description in [1].
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Virtual memory is split up into two separate spaces:
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one space containing the instructions,
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the other all the data, including stack and heap (D-space).
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The procedure descriptors are preprocessed and stored in a separate array,
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\fIproctab[]\fP.
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Both spaces start off at address 0.
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This is possible because pointers in the two different spaces are
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distinguishable by context (and shadow-bytes: see 2.6).
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.NH 3
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Instruction Space
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.PP
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Figure 1 shows the I-space, together with the position of some important
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EM registers.
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.Dr 12
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NEXT --> |________________| <-- DB \e
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| | | T
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| | <-- PC |
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| Program | | e
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| Text | | x
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0 --> |________________| <--(PB) /
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.Df
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\fI Fig 1. Virtual instruction space (I-space).\fP
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.De
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.PP
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The I-space is just big enough to contain all the instructions.
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The size needed for the program text (\fINTEXT\fP) is found from the
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header-bytes of the loadfile.
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Legal values for the program counter (\fIPC\fP) consist of all
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addresses in the range from 0 through \fINTEXT\fP \- 1.
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If the \fIPC\fP is made to point to an illegal address, a trap will occur.
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.NH 3
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The Procedure Table
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.PP
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The \fINProc\fP constant indicates how many procedure descriptors there
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are in the proctab array.
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Elements of this array contain for each procedure: the number of locals, the
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entry point and the entry point of the textually following procedure. This is
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used in testing the restriction that the program counter may not wander from
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procedure to procedure.
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.NH 3
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The Data Space
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.PP
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Figure 2 shows the layout of the data space, which closely conforms to the EM
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Manual.
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.Dr 36
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__________________
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maxaddr(psize) --> | | <-- ML \e
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| | | S
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| Locals | | t
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| & | | a
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| RSBs | | c
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| | | k
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|________________| <-- SP /
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. .
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. .
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. Unused .
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. .
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. .
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. .
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. .
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. .
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. Unused .
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. .
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. .
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|________________| <-- HP
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| Heap | |
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|________________| <-- HB |
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| | | D
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| Arguments | |
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| Environ | | a
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| _ _ _ _ | |
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| | | a
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| Global data | |
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0 --> |________________| <--(EB) /
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.Df
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\fI Fig 2. Virtual dataspace (D-space).\fP
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.De
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.PP
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D-space begins at address 0, and ends at the largest address
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representable by the pointer size (\fIpsize\fP) being used;
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for a 2-byte pointer size this maximum address is
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.DS
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((2 ^ 16 \- 1) / word size * word size) \- 1
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.DE
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for a 4-byte pointer size it is
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.DS
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((2 ^ 31 \- 1) / word size * word size) \- 1
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.DE
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(not 2 ^ 32, to allow illegal pointers to be implemented in the future). The
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funny rounding construction is required to make ML+1 expressible as the
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initialisation value of LB and SP.
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.PP
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D-space is split into two partitions: Data and Stack (indicated by the
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brackets).
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The Data partition holds the global data area (GDA) and the heap.
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Its initial size is given by the loadfile constant SZDATA.
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Some space is added to it, because arguments and environment are
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stored here also.
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This total size is static while interpreting.
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However, as the heap may grow during execution (e.g. caused by dynamic
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allocation) this results in a variable size for the Data partition.
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Initially, the size for the Data partition is the sum of the space needed
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by the GDA (including the space needed for arguments and environment) and
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the initial heapspace.
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The lowest legal Data address is 0; the highest \fIHP\fP \- 1.
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.LP
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The Stack partition holds the stack.
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It begins at the highest available D-space address, and grows
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towards the low addresses, so the Stack partition is of variable size too.
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The lowest legal Stack address is the stackpointer (\fISP\fP),
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the highest is the memory limit (\fIML\fP).
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.NH 2
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Physical lay-out
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.PP
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Each partition is mapped onto a piece of physical memory with the
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same name: \fItext\fP (fig. 1), \fIstack\fP and \fIdata\fP (fig. 2).
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These are the storage structures which \fBint\fP uses to physically
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store the contents of the virtual EM spaces.
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Figure 2 thus shows the mapping of D-space onto two
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different physical parts: \fIstack\fP and \fIdata\fP.
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The I-space is represented by one physical part: \fItext\fP.
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.LP
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Each time more space is needed, the actual partition is reallocated,
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with the new size being computed with the formula:
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.DS
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\fInew size\fP = 1.5 \(mu (\fIold size\fP + \fIextra\fP)
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.DE
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\fIextra\fP is the number of bytes exceeding the \fIold size\fP.
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One can prove that using this method, there is a
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linear relationship between allocation time and needed partition size.
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.PP
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A virtual D-space starting at address 0 is in correspondence with
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the definition in [1], p. 3\-6.
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The main reason for having D-space start at address 0, is that it induces
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a one-one correspondence between the heap \- and GDA
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addresses on the virtual machine (and hence the definition) on one hand,
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and the offset within the \fIdata\fP partition on the other.
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This implies that no extra calculation is needed to perform load and
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storage operations.
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.LP
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Some calculation however cannot be avoided, because the stack part of
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the D-space grows downwards by EM definition.
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The first address of the virtual stack (\fIML\fP, the maximum address for
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the given \fIpsize\fP) is mapped onto the
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beginning of the \fIstack\fP partition.
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When the stack grows (i.e. EM addresses get lower), the offset within the
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\fIstack\fP partition gets higher.
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By taking offset \fIML \- A\fP in the stack partition, one obtains the
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physical address corresponding to some virtual EM (stack) address \fIA\fP.
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.NH 2
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Speed.
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.PP
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From several test results with both versions of the interpreter, the
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following may be concluded.
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The speed of the interpreter depends strongly on the type of
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program being interpreted.
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If plain CPU arithmetic is performed, the interpreter is
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relatively slow (1000 \(mu the cc version).
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When stack manipulation is at hand, the interpreter is
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quite fast (100 \(mu the cc version).
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.LP
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Most programs however will not be this extreme, so an interpretation
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time of somewhere between 300 and 500 times direct execution
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for a normal program is to be expected.
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.LP
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The fast version runs in about 60% of the time of the full version, at the
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expense of a considerably lower functionality.
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Tallying costs about 10%.
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