UNIVERSITY OF 
 
 ILLINOIS LIBRARY 
 
 AT URBANA-CHAMPAIGN 
 
Z-^^^ UTlJCDCS-R-75-7i+5 
 
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 IHii LIUKAKY OH iH£ 
 
 SEP 8 1975 
 
 iirjivfriTv OF II I iMOr. 
 
 AN INTERACTIVE TABLE -DRIVEN PARSER SYSTEM 
 
 by 
 
 Michael Harry Tindall 
 
 August, 1975 
 
Digitized by the Internet Archive 
 in 2013 
 
 http://archive.org/details/interactivetable745tind 
 
UTUCDCS-R-75-7^5 
 
 AN INTERACTIVE TABLE -DRIVE PARSER SYSTEM 
 
 by 
 
 Michael Harry Tindall 
 
 August, 1975 
 
 Department of Computer Science 
 University of Illinois at Urbana-Champaign 
 Urbana, Illinois 6I8OI 
 
 *This work' was supported in part by the IBM Corporation, Thomas J. Watson 
 Research Laboratory and the National Science Foundation, Grant No. 
 EC -^1511 and was submitted in partial fulfillment of the requirements 
 for the degree of Master of Science in Computer Science, August 1975* 
 
iii 
 
 ACKNOWLEDGEMENT 
 
 I would like to express my graditude to my thesis advisor, 
 Professor Thomas Wilcox. He provided many s\:;ggestions and much useful 
 guidance during my work on this project. 
 
 Thanks are also in order for Mike Mj.lner and Bob Barnett who 
 worked on the initial implementations of Fortran IV and COBOL. They provided 
 very useful feedback on the operations and design of the overall system, 
 and their assistance is greatly appreciated. 
 
 Also, a word of thanks goes to Cinda Robbins for her excellent 
 typing of this manuscript. 
 
(. 
 
iv 
 
 TABLE OF CONTENTS 
 
 Page 
 
 ACKNOWLEDGMENT iii 
 
 1. INTRODUCTION • 1 
 
 1.1 Organization of this Thesis 1 
 
 1.2 The Compiling Environment 1 
 
 1.3 The Interative Compiler 2 
 
 2. THE TRANSITION DIAGRAM PARSING MODEL k 
 
 2.1 The Basic Model h 
 
 2 .2 Extensions to the Model 9 
 
 3. ASSEMBLER SYNTAX SOURCE INSTRUCTION SPECIFICATION ... 10 
 
 3-1 Introduction and Chapter Organization 10 
 
 3.2 Overall Organization of the Syntax 
 
 Specification ik 
 
 3.3 Parser Action Instruction Description 22 
 
 3.^ Description of Valid Parameters Used in Action 
 
 Instructions 36 
 
 h. THE PARSER TABLE INSTRUCTION FORMS k^J 
 
 U.l Notation., i+Y 
 
 U.2 The Table Instructions 48 
 
 5. THE COMPILER'S TABLE MAINTENANCE SYSTEM 57 
 
 5.1 Maintenance System's Purpose 57 
 
 5 .2 General Operation of the Maintenance System ... 57 
 
 5.3 Logging into the Maintenance System . 58 
 
 5-4 Preparing the Syntax Table for the Compiler 
 
 System 64 
 
 6. FUTURE DEA/ELOIMENT 67 
 
 LIST OF REFERENCES 69 
 
 APPENDIX • 70 
 
CHAPTER 1. 
 1. INTRODUCTION 
 
 1.1 Organization of this Thesis 
 
 This paper discusses the design and implementation of a table- 
 driven syntactic parser with concurrent static semantic checks to he used 
 in an interactive compiling environment. After a brief introduction in 
 this chapter to the compiling environment in which the parser is to be used, 
 and the the general operation of the parser system. Chapter 2 will present 
 a model of the selected transition diagram parsing technique. Chapter 3 
 contains documentation on the parser's assembler language syntax source 
 instruction specification. Chapter h contains detailed documentation 
 on the form of each instruction that is used in the actual parser table. 
 Chapter 5 describes the ta.ble maintenance system that is used by the 
 compiler system, and the thesis concludes with a few comments about 
 further refinements that can be made to this parsing system. 
 
 1.2 The Compiling Environment 
 
 Recently a project at the University of Illinois at Urbana- 
 Champaign has been under way to automate the teaching of the basic 
 Computer Science courses by utilizing the PLA.TO IV computer-aided 
 instructional system that is being developed on this campus [h]. This 
 computer system features an excellent graphical display terminal and 
 fairly sophisticated computer-aided instructional software support for 
 the writing of instructional lessons and the corresponding course 
 curriculum [5]. The curriculum that is being implemented will teach new 
 
2 
 
 comp-uter science programming language concepts and constructs. Specific 
 programming detail on a variety of languages (e.g., FORTRAN IV, PL/1, COBOL, 
 basic) is available; students will progress at their own speeds thro-ugh a 
 fairly flexible course structure [2], An important part of the system is 
 an online compiler in which a student can easily and conveniently try out 
 new programming constructs immediately after learning about them in an 
 instructional lesson. 
 
 The remainder of this paper will discuss this compiler and, 
 in particular, the parser system that is used in the compiler. 
 r 
 
 1.3 The Interative Compiler 
 
 A number of design criterion emerge from examining the environment 
 for this compiler system. First, the compiler should be as interactive as 
 possible to utilize the PLATO IV system effectively and to maintain a desirable 
 computer-aided instructional environment for the student. To accomplish this, 
 the compiler compiles character-by-character, that is, each single key 
 press by the student using the compiler is examined immediately as the student 
 types it in; thus the compiler keeps up completely with the student and detects 
 programming syntax errors as soon as possible. The student is able to edit 
 his program by moving a cursor through the program on the screen. The 
 compiler moves with the cursor, compiling when the cursor moves forward in 
 the program, and backing-up ("un compiling", i.e., resetting the lexical and 
 syntactical analyzers to previous states) when the cursor moves backward in 
 the program. Thus, the compiler is highly interactive and easy to use. 
 
 A second design criterion for the compiler is that it be multilingual. 
 To accomplish this, the compiler is completely table -driven; to allow 
 
3 
 
 another language to be recognized by the compiler system and used 
 
 by students, a language designer must merely fill in a new set 
 of tables and provide an execution supervisor system for the actual 
 interpretive execution of compiled programs. This paper is concerned 
 with one of these compiler tables, neunely, the syntax parser table. 
 
 A third design criterion for the compiler is that it provide a. 
 a high and sophisticated level of error diagnostics for the student 
 when a syntactic or semantic error is detected in the program by the 
 parser system. Since the intended users of the compiler are beginning 
 students, the error messages must be direct and to-the-point . To 
 accomplish this goal, an automatic, interactive error diagnostic system 
 
 has been designed and implemented [6]. The important point for this 
 discussion is that this automatic error system is driven by the compiler'. 
 syntax tables, that is, it is essentially language-independent. Thus, 
 it is apparent that these syntax tables are a very important part of 
 this compiler system. 
 
 We now examine a model for the transition diagram parsing 
 technique used by the compiler system. 
 
CHAPTER 2. 
 2. THE TRMSITION DIAGRAM PARSING MODEL 
 . 2.1 The Basic Model 
 
 The syntactic analyzer used in this interactive compiler is 
 based on the transition diagram systems first introduced by Conway [1], 
 and recently formalized by Lomet [3]. A transition diagram system 
 consists of a set of nested push-down automata (NPDA) that have the 
 capability of invoking one another. The remainder of this section will 
 present first an intuitive, graphical description of transition diagram 
 systems, followed by a slightly more formal description of the transition 
 diagram model. 
 
 A key concept of a transition diagram parser is that of the 
 parser "STATE": the STATE is a descriptor that maintains information 
 about what input has already been accepted and what further inputs would 
 be acceptable to the parser. While "STATE" is a very important concept, 
 it is a very easy thing to visualize and implement in a transition diagram 
 system. For the rest of this paper, STATE refers to this "state of the 
 parse". 
 
 "The action of a transition diagram parser is to examine the 
 "possible" or "acceptable" parsing options (determined by the current STATE 
 and the (transition idagrams) along with the current input token; based on 
 this information, the parser will accept the token by updating the STATE 
 information and asking for a new input token, or reject the current input 
 token and signal a syntactic/semantic error if the token does not satisfy 
 any of the available options. Note that all the parsing options are defined 
 
in terms of "tokens" only, that is, the tokens that are acciomulated and 
 
 output from the lexical analyzer. This process can be conveniently shown 
 graphically as follows : 
 Let 
 
 SI 
 
 denote STATE "Si"; each branch out of a STATE corresponds to a 
 possible syntax option for that STATE: these branches are 
 labeled with their particular syntactic option requirements 
 (these labels will be described as the paper progresses). 
 Then, a PL/l "GOTO" statement can be shown in transition diagram form as i 
 
 "GOTO" 
 
 'GO' 
 
 S2 
 
 'TO' 
 
 [label-name] /"^)A ";" , ^^ 
 
 This is interpreted as: if the parser is in STATE SI and the current 
 input token is "GOTO", make the state transition to STATE S3; if the 
 following token is a [label-name], move to STATE Sk; if the token after 
 
that is ";", accept it, and (in this case) accept an entire "GOTO" state- 
 ment. Note that if none of the branch options for the current STATE 
 satisfies the current input token, then that token is in error, and the 
 normal parsing error condition should be signaled. 
 Another example is a PL/l "IF" statement: 
 
 SI 
 
 'IF' 
 
 S2 
 
 <conditional"expr> 
 
 S3 
 
 "THEN" 
 
 $k 
 
 <statement> 
 
 <statement> 
 
 ST 
 
 In this case, notice the references to <conditional-expr> and <statement> 
 as labels on option branches: this indicates that if, for example, the 
 parser is in STATE S2, then when trying to accept the input token, it 
 should refer to another transition diagram in the system, corresponding 
 to <conditional-expr>; after a <conditional-expr> has been parsed and 
 accepted, the parser should then return to STATE SS, having successfully 
 satisfied the <condtional-expr> option branch out of STATE S2. This is 
 an example of one transition diagram "invoking" ("calling", "referring to") 
 another . 
 
 One more example is needed to illustrate another important 
 feature of transition diagrams: a transition diagram system which 
 has been invoked by another transition diagram has the capability of return- 
 ing to one of a number of possible STATES in the invoking transition diagrsim. 
 A good example of where this is useful arises in trying to parse a (simplified) 
 
PL/I <conditional-expr> as follows: 
 
 expression parentheses 
 
 ( ( ( I + 100 ) * J ) = K ) 
 
 L 
 
 conditional expression parentheses 
 
 When the initial parentheses "(" are examined, it is not knovm whether 
 they are part of the overall conditional expression or are part of the 
 inside simple expression. The technique to solve this ambiguity is to 
 allow an "invoked" transition diagram to return to more than one STATE 
 in the "calling" transition diagram, depending on what tokens are found 
 later on. 
 
 The diagram for <conditional-expr> can be drawn as : 
 
8 
 
 In this case, each time <conditional-expr> is invoked, 2 return STATES 
 
 n 
 are specified (i.e., Rl and R2); when the parser reaches 
 
 , it 
 
 returns to return-state n. Note that the way in which this <conditional- 
 expr> has been drawn corresponds to assuming that the initial "(" belongs 
 to the overall conditional expression; if it turns out they actually 
 belonged to the first simple expression, then the parse is resumed at 
 point 5, which accepts the assixmed "conditional" parenthesis and continues 
 parsing the simple expression. 
 
 As a more formal description, a transition diagram system consists 
 of a set of nested push-down automata (NPDA) that have the capability of 
 invoking one another. Each NPDA is capable of reading a portion of the 
 input string and accepting or rejecting it. Lomet calls the NPDA that 
 are capable of being invoked "submachines"; the initial STATE of a 
 submachine is known as its "entry" STATE and a submachine is invoked by 
 the use of its entry STATE number by another NPDA. This results in the 
 invoking STATE being saved at the top of a parser stack and the parse 
 resumed at the new entry STATE. Each submachine also contains one or 
 more "exit" STATEs; when an exit STATE is reached, the top of the stack 
 together with the particular exit STATE determine the STATE in the 
 original invoking NPDA with which to continue the parse. An error in 
 the parse is detected if an NPDA reads a token from the input string for 
 which there is no corresponding STATE transition that the NPDA can make. 
 The reader is referred to the discussion by Lomet [3] for further technical 
 details. 
 
2.2 Extensions to the Model 
 
 The preceding discussion in this chapter describes a parser 
 model that is sufficiently powerful to recognize all deterministic 
 context-free languages [3]' A few extensions to the model have actually- 
 been included in the compiler's parser system to enable the handling 
 of context-sensitive static semantic requirements such as proper and 
 consistent declaration of attributes for an identifier, consistent 
 references to declared array variables^ etc. These extensions include 
 allowing auxiliary memory variables to be utilized by the parser (for 
 operations such as counting the number of subscripts in an array reference), 
 allowing the labels on any branch in a transition diagram to refer to any 
 of these auxiliary variables or any symbol table field, and allowing special, 
 language -dependent semantic -subroutines to be invoked at appropriate 
 times during the operations of the parser system. 
 
 To summarize the activities of a transition diagram parser: it 
 must be capable of requesting that a new input token be read in; it has to 
 be able to test the current input token to decide which labeled branch to 
 follow out of the current STATE; it must have facilities to manipulate 
 a return-state parser stack; and, finally, it must be able to perform 
 any semantic analysis that is required by a particular language. 
 
10 
 CHAPTER 3. 
 3. ASSEMBLER SYNTAX SOURCE INSTRUCTION SPECIFICATION 
 3.1 Introduction and Chapter Organization 
 
 3.1.1 The Syntax Parser Table Description 
 
 A table-driven parser system has been designed that incorporates 
 the actions described in the preceding chapter. The syntax table is 
 actually an encoding of the programming language syntax productions in a 
 small, interpretable instruction set. The parser of the compiler consists 
 of a routine that interprets this instruction set in an appropriate way 
 (this routine can be called the "table interpreter" or "table driven" 
 routine). 
 
 The parser has control over and maintains certain tables and 
 data structures within the compiler. All of these tables and structures 
 are located in a region of memory that is referred to as the parser 
 storage area. One particular variable that is maintained is the parser 
 STATE variable. This variable always points to some instruction in the 
 syntax table. As the input string is parsed, this state pointer variable 
 is updated (i.e., moved to point to a different sequence) to reflect the 
 current state of the parse. 
 
 The parser maintains two stacks. The first is the regular 
 parsing return-state stack which is used when one NPDA invokes another. 
 The other stack is called the "variable stack"; it is used by a language 
 implementor to save miscellaneous information as the parse of an input 
 string progresses; the language implementor has control over the 
 
11 
 
 manipulation of entries in this stack: when to put new entries on the 
 stack and delete entries from the stack (synchronized with PROC entry 
 and exit), or change the value stored in an entry on the stack. 
 
 There are also certain tables that are maintained by the 
 parser. These include the compiler's symbol-table and the compiler's 
 block structure tables. Entries from these tables can be examined or 
 modified by the parser with the complete control of the language implernentor. 
 
 The action of the parser system in the compiler is to examine 
 and interpret, beginning at some location in the syntax table (determined 
 by the STATE variable), the table instructions that specify the acceptable 
 syntax for the programming language. The instructions are interpreted 
 sequentially unless a particular instruction modifies the parser's table 
 instruction pointer. 
 
 For convenience in specifying the instructions in the parser 
 table, an assembler language representation for each table instruction 
 has been designed, and an assembler program is provided as part of the 
 compiler system's maintanence utilities (chapter 5) that translates the 
 assembler source language representation into the actual table instruction 
 form that is used by the compiler system.. The remainder of this chapter 
 documents the assembler source language specification requirements, and 
 chapter h documents the actual table form of the parser table instructions. 
 
 3.1.2 Chapter Organization 
 
 This chapter documents the assembler source language that is 
 used to specify the syntactic requirements for a programming language. 
 
12 
 
 Once a syntax source representation for the language has been prepared 
 (using the compiler system's table builder option), an assembler program 
 will translate the source representation into a compact table form to be 
 used by the actual compiler. 
 
 The chapter is divided into three major sections as follows : 
 Section 3.2: Overall Organization of the Syntax Specification. 
 
 Discusses the proper ordering of instructions for the syntax 
 specification; discusses the function and use of procedures 
 (PROC-EKD blocks) in the specification; explains the form 
 and the use of the mnemonic definition (DEFINE) instruction, 
 the storage allocation (ALLOCATE) instruction, the different 
 error NAME instructions, and the purpose and form of the FINAL 
 PARSE STATE instruction. 
 Section 3-3'- Parser Action Instructions. 
 
 Discusses the form and purpose of the instructions that are 
 used to control the actions of the parser: SCAN, GOTO, CALLI, 
 CALL, RETI, RET, BC, SEMA, and the auxiliary environment - 
 changing instructions (ASSIGN, MASKON, MASKOFF, ADDIT, SUBIT). 
 Section 3-^: Description of Valid Parameters used in Action Instructions, 
 CLASS, PDN, UDN, PDSTP, UDSTP, defined constants, ALLOCATEd 
 variables, Symbol-table entries. Block-table entries and TEMP 
 variables . 
 
 3.1.3 Source Text Preparation Rules 
 
 The rules for preparing the syntax source specification for the 
 assembler program are as follows: 
 
13 
 
 1) Names: 
 
 All def Ined-names , variable-names, PROC-names and label-names 
 
 discussed in this paper are of the form: 
 
 Any ccambination of 9 letters and number, with the first character 
 being a letter (note that capital letters are acceptable, 
 but they require 2 character positions in the name), 
 
 2) Form of instructions: 
 
 a) All instructions in section 3.2 are of the form: 
 
 <instruction> eol 
 that is, one instruction per line. The eol is inserted 
 automatically by the editor program when a line is terminated. 
 No explicit spacing is required within a line (free form, 
 extra blanks ignored), 
 
 b) All instructions in section 3.3 (Action Instructions) are 
 of the form: 
 
 <label> <instruction> eol 
 where the <label> is optional in all cases (except on 
 instructions following a RETI, RET, GOTO, or unconditional 
 branch (BC TRUE) instruction). The <label>, if present, 
 marks the table-location for that instruction: control may 
 then be passed to these <labe]>s via a BC, GOTO, or the 
 multiple-return form of the CALLI and CALL instructions. It 
 is suggested for readability (not required) that all 
 <Label>s begin at the left margin and all instructions begin 
 at the normal tab position. 
 
lU 
 c) The following "brackets" are used in dociimenting the valid 
 forms of instructions: 
 [,..] : The specifications inside the [...] may appear 
 
 or 1 times. 
 {...} : The specifications inside the (...) may appear any 
 
 number of times. (0,1,2, ,..). 
 {.,.] : The specifications may appear at most "n" times 
 (0,1,2, ..., n). 
 3) Throughout the remainder of this chapter all instruction 
 "^ keywords that are discussed will be CAPITALIZED for emphasis. 
 
 However, as shown in the various examples given, these key- 
 words are accepted in lower case only by the assembler program. 
 k) An asterisk appearing anywhere on a line causes the rest of 
 the line to be treated as a comm^ent. Comments may be used 
 liberally. 
 
 3.2 Overall Organization of the Syntax Specification 
 
 3.2.1 Syntax Source Text Organization 
 
 The normal form for the syntax source text is to have the main 
 procedure text first, followed by a sequence of PROC - END blocks. 
 
 The main procedure text contains all DEFINE instructions, follow- 
 ed by all global variable ALLOCATE instructions, followed by all error system 
 instructions (CLASS NAME, IlASK NAME, FIELDPDN, and ERROR MESSAGE), followed by 
 the main parsing procedure (generally containing references to some PROCs). 
 
15 
 
 The final FROC - END block is followed by END SYNA, which 
 signals the physical end of the Syntax Source Representation. 
 SUMMARY ; 
 
 [DEFINE instructions] 
 
 {Global ALLOCATE instructions] 
 
 (CLASS NAME instructions] 
 
 (MASK NAME instructions] 
 
 (ERROR MESSAGE instructions] 
 
 (FIELDFDN instructions] 
 
 • « main parsing procedure 
 
 (PROC - END blocks] 
 
 END SYM 
 
 3.2.2 PROC - END blocks 
 
 The purpose of PROC - EKD blocks is to make transition diagram 
 submachines well defined constructs. 
 FORM : 
 
 PROC <procname> [(<ar^ f,<arg>]^)] [RETURN <#rets>] 
 
 [NAME (<error print name>) ] eol 
 
 (local variable ALLOCATE instructions] 
 
 proc instructions J including at least 1 RET instruction 
 
 END PROC eol 
 ACTION: 
 <procname> is the procedure name. 
 
 The arg\iment list is optional however, a PROC must be 
 
 consistently specified. The maximum number of arguments for a procedure 
 is 5. The <arg>s (if present) are considered to be local va.riables to the 
 
16 
 procediare (call by value, no result returned). They do not need to be 
 ALLOCATEd (the assembler will automatically allocate space for any procedure 
 <arg>s), however they may be included in an ALLOCATE statement inside the 
 PROC if desired (the assembler accepts either implicit or explicit alloca- 
 tion in this case) (see section 3*2.6 for more information about local 
 variable ALLOCATE instructions). 
 
 The MULTIPLE RETURN option is available to allow the parser to 
 return to more than one state in the Syntax Specification after the procedure 
 has been executed (see section 3«3.3- 3.3.6 for more information on 
 CALLing and RETurning from procedures). The MULTIPLE RETURN option must be 
 specified only if the PROC uses multiple returns. If the PROC uses multiple 
 returns, the <#rets> parameter (which must be a numeric constant) specifies 
 the number of locations the procedure may return to (the maximum number is 
 
 31). 
 
 The NAME option is for use by the compiler's autmatic sjmtax 
 error system. The <error print name> chosen for a PROC should be a 
 short logical name that describes the function of the PROC (examples: 
 "statement", "expression", "declaration list", "array bound", etc.) (see 
 section 3.2.7 for more information about <error print names>). 
 EXAMPLE : 
 
 proc expr (type) return 2 name (expression) eol 
 
 end proc eol 
 
17 
 
 3.2.3 ENTRY Instruction 
 FORM : 
 
 ENTRY <Procnajne> rN/VME(<error print namo)] eol 
 ACTION : 
 
 Defines an alternate entry point into the containing PROC. 
 The <procname> is treated as a regular procedure name in CALL instructions. 
 However, all of the attributes of the ENTRY <procname> are the same as those 
 of the outer PROC: 
 
 number and order of parameter arguments; 
 
 niimber of multiple return points; 
 
 ni:unber of local variables. 
 
 Furthermore, none of these attributes can be specified at the ENTRY instruc- 
 tion only at the containing PROC. The only unique attribute of an 
 
 ENTRY <procname> is the (possibly) unique <error print name>, 
 EXAMPLE : 
 
 entry operand name (operand) eol 
 
 3o2.i+ END SYNA Instruction 
 FORM : 
 
 END SYNA eol 
 ACTION : 
 
 Signals the physical end of the syntax source text to the 
 assembler. 
 
18 
 
 3.2.5 DEFINE Instruction 
 FORM : 
 
 DEFINE <name> = <constant> {, <3!ianie> = <constant>} eol 
 ACTION: 
 
 This instruction is used to define mnemonic constants for the 
 assembler to use. No table code is actually generated for this instruc- 
 tion. 
 
 Note that <constant> can be either a numeric constant or a 
 previously defined mnemonic constant, 
 EXAMPLE : 
 
 define ifx = 0, colonx = lOU, dclvar = 10 eol 
 ALL DEFINE instructions must preceed all other statements of the syntax 
 source specification, 
 
 ALTERMATE FORM : 
 
 Instead of <constant> above, 
 
 MASK (<12-bit mask of O's and 1 ' s>) 
 can be used. There must be exactly 12 bits specified between the 
 parentheses. 
 
 This is a convenient way to define a particular mask bit 
 
 pattern. 
 
 EXAMPLE : 
 
 define n-jxaeric = mask ( 000001011111 ) eol 
 It is also legal to combine the two forms of the DEFINE instruction on the 
 same line. 
 
19 
 
 EXAMPLE : 
 
 define ifx = 0, numeric = mask ( 000001011111 ) , dclvar = 10 eol 
 
 3.2.6 ALLOCATE Instructions 
 FORM : 
 
 ALLOCATE <variable> (, <variable>} eol 
 ACTION : 
 
 Causes variable storage to be allocated on a stack in the 
 compiler. These storage locations are referenced by using the name 
 <variable>. 
 
 Note that the allocated storage will be a GLOBAL allocation if 
 the ALLOCATE instruction comes at the beginning of the syntax program 
 (i.e., before the first PROC - END block definition) and a LOCAL allocation 
 (implying possibly recursive allocation) if the ALLOCATE instruction is 
 within a PROC - END construct. 
 
 Global variables can be referenced from anywhere within the 
 syntax specification, whereas local variables can be referenced only 
 from within the PROC - END block in which they were allocated. 
 
 3.2.7 Error System Instructions 
 FORMS : 
 
 CLASS NAME <c lass -numb er> (<error print name>) eol 
 
 MASK NAME <mask-pattem>(<error print name>)" eol 
 
 ERROR MESSAGE <error-number> (<overide error message text>) eol 
 
 FIELDPDN <pdn-number> {,<pdn-number>} eol 
 
20 
 ACTION : 
 
 The purpose of the CLASS NAME and mSK NAME instructions, as 
 well as the procedure NAME instruction (see documentation on PROC - END 
 blocks) is to provide the compiler's automatic error analysis system 
 with text to refer to CLASSes, MASKs and specific errors that appear in 
 the parser environment. 
 
 The automatic error analysis system interacts with the user by 
 suggesting different modifications that can be made to correct an error 
 in the program. Many of these suggestions need to be made in the termin- 
 ology of the programming language involved; these NAME instructions 
 provide the correlation between things in the parser environment and the 
 language terminology that describes these things. 
 
 Typical messages using these NAMES are: 
 "Replace | | with a relational operator. " Class Najne 
 
 "Insert an array bound in front of I 1 ." Proc Name 
 
 "Replace I I with a declared variable ( numeric ) ." Class, Mask Names 
 Each Mask pattern that is used in the mask form of the conditional branch 
 instruction (see section 3.3.7.3) and each CLASS number should be given an 
 associated error name. 
 
 The ERROR MESSAGE instruction is used to override the operation 
 and analysis of the automatic error system. If the error number signalled 
 by the parser (via a conditional branch (be) instruction) matches the 
 <error-number> given in an ERROR MESSAGE instruction, then the overide 
 text is displayed to the user and all subsequent error analysis processing 
 is aborted. 
 
21 
 Finally, the FIELDPDN instruction is used to inform the error 
 system a.bout which pdn numbers (section 3.^.3.3) represent "field tokens"; 
 each field pdn number should be included in a FIELDPDN instruction. 
 EXAMPLES : 
 
 class name punct (punctuation) eol 
 
 mask name numeric (numeric variable) eol 
 
 fieldpdn label, stmt eol 
 
 3.2.8 FimL PARSE STATE Instruction 
 FORM : 
 
 FINAL PARSE STATE eol 
 ACTION : 
 
 Before the "execution" of a compiled user program can be 
 attempted, there must be some way for the compiler supervisor system 
 to verify that the program is indeed "complete" (since in the interactive 
 compiling environment a user could request execution of an unfinished 
 program). 
 
 This instruction indicates to the parser that it is in the 
 program- accepting state; that is, the program can be executed if and 
 only if the parser is in this state. 
 
 There must be exactly one accepting state specified in the 
 Syntax Specification (i.e., the FINAL PARSE STATE instruction must occur 
 exactly once). 
 
22 
 3- 3 Parser Action Instruction Description 
 
 This section describes the form and use of the assembler instruc- 
 tions that allow a language designer /implement or to fully specify the 
 syntactic and semantic requirements of the language being implemented. 
 These instructions constitute an implementation of the augmented parser 
 transition diagram model discussed in Chapter 2 of this paper. The 
 instructions allow invoking and returning from "subma chines" (PROCs in 
 this assembler language), examining the current input token (from the 
 lexical analyzer) for validity, both syntactically and semantically 
 (i.e., context-sensitive requirements), accepting the current token and 
 requesting that a new token be input from the lexical analyzer, and 
 finally, a few instructions allow changes to be made to the parser 
 environment (i.e., symbol-table modifications or parser ALLOCATEd variable 
 modifications). 
 
 One further note: many of the instructions to be described 
 refer to general "parameters", which are the operand (s) used by the 
 instructions. These parameters will be referred to as <parra>, or <parml> 
 and <parm2> in the form of the instructions. In all cases, these <parm>s 
 will resolve to a memory location in the parser environment (like a symbol- 
 table reference). These <parra>s are discussed in detail in section 
 3.^ of this paper. 
 
 The remainder of this section will discuss the Action Instructions: 
 SCAN, GOTO, CALLI, CALL, RETI, RET, BC, SEMA, and the aiixiliary environment- 
 changing instructions (ASSIGN, MASKON, MASKOFF, ADDIT, SUBIT). 
 
23 
 
 3.3.1 SCAJJ Instruction 
 FORM : 
 
 SCAN eol 
 ACTION : 
 
 Causes a return to LEXI for another token. When the next 
 token comes in, the parser resumes parsing at the State following the 
 SCAN instruction (i.e., at the table-location following the SCAN 
 instruction's table-location), 
 
 3.3.2 GOTO Instruction 
 FORM : 
 
 GOTO <label> eol 
 ACTION : 
 
 Causes a SCAN instruction to be executed, followed by an 
 unconditional branch to the instruction corresponding to <label> in the 
 table. 
 EXAMPLE : 
 
 goto stmntl eol 
 
 3.3.3 CALLI Instruction 
 FORM: 
 
 CALLI <procname> [(<parm> {, <parm>})] [, THEN<Label> {,<Label>}] eol 
 ACTION : 
 
 This instruction is used to invoke a EROC with the name <procname>. 
 
 (see section 3.2.2 and 3.2.3.) 
 
2k 
 
 Causes a return address (table-location) to be saved on the 
 parser stack, passes the argument values to the proper local variables 
 in <procname>j and resumes parsing at <procname> table-location. 
 
 When a return instruction (RETT, RET) is executed, the 
 proper return label location is selected, the parser stack is popped, 
 and parsing is resumed at the new location. If the PROC multiple-return 
 option is not used, parsing is resumed at the location of the instruction 
 following the CALLI ( or CALL) instruction. 
 
 Note that the parameter argument values are passed into the 
 PROC only, and that the final values are not passed back to the parajneter 
 argument upon returning from the PROC (i.e., call - by - value only). 
 
 Note also that all instances of the multiple return option for 
 a PROC must be consistently specified (both in the CALLI (CALL) instruc- 
 tions and in the PROC - END definition). 
 EXAMPLE : 
 
 calli var (m,n), then labl, lab2 eol 
 
 3.3.^ CALL Instruction 
 FORM ; 
 
 Same as CALLI instruction 
 
 ACTION : 
 
 Causes a SCAN instruction to be executed, follcswed by a CALLI 
 instruction. 
 
 EXAMPLE ; 
 
 call subscr eol 
 
25 
 
 3.3.5 RETT Instruction 
 FORM ; 
 
 RETI [<retum-nuinber>] eol 
 ACTION ; 
 
 Causes a return from a previously invoked PROC (see section 
 
 3.3.3). 
 
 If the PROC has any locally-ALLOCATEd variables, the space is 
 deallocated from the variable-storage stack in the parser environment. 
 Then the return address (table location) is popped off of the regular 
 parser stack. 
 
 If the multiple-return option is not used by this FROC, parsing 
 resumes at the popped return address location. 
 
 If the multiple -re turn option is used by the PROC, the 
 "re turn -number "th <label> given in the original CALLI (CALL) instruction 
 is selected and parsing resumes at the table -location corresponding to 
 this selected <label>. 
 
 Note that <return-number> must be a constant (or a mnemonic 
 defined constant) in the assembler. 
 EXAMPLE : 
 
 reti 2 eol 
 
 3.3.6 RET Instruction 
 FORM ; 
 
 Same as RETI Instruction 
 
26 
 
 ACTION ; 
 
 Causes a SCAIT instruction to be executed, followed by a RETI 
 instruction. 
 EXAMPLE : 
 
 ret eol 
 
 3.3.7 BC Instruction 
 
 f 3.3.7.1 Normal BC Instruction 
 
 FORM ; 
 
 BC <relation-type>, <parml>, <parm2>, <true-option> eol 
 where 
 
 <relation-type> : ;=BQ J NE | GT | GE | LT | LE 
 <true-option> ; :=<label> | ERROR [<parm>] 
 ACTION : 
 
 Causes the 2 <parm>s to be compared according to <relation- 
 type>. 
 
 If the comparison is false, the <true-option> is ignored and 
 control falls through to the next instruction in the table. 
 
 If the comparison is true, the <true-option> is taken; 
 If <true-option> is a <Label>, then parsing resumes immediately 
 
 at the table -location corresponding to that label. 
 Otherwise, <true-option> is a syntax error indicator; this causes 
 the parser to halt its operation and compiler control is pass- 
 ed to the compiler's error analysis system, with an Error Number 
 equal to the value of the <parm> (if specified). 
 
27 
 
 In the compiler's automatic error analyzer, the Error 
 Numbers are ignored unless an ERROR MESSAGE instruction for 
 the particular Error Number has been included with the Syntax 
 Specification (see section 3.2.7 of this paper). 
 
 In a hand-coded compiler error system, the Error Number 
 can be used to display a unique error message to the user. 
 The BC instruction is the only instruction that is available to signal 
 that a syntactic/ semantic error has occurred. 
 
 Note that <parml> cannot be a constant or mnemonic defined 
 constant. 
 EXAMPLES : 
 
 be ne, pdn, colonx, not lab eol 
 be eq, class, dclvar, assign eol 
 be ne, pdn, thenx, error 10 eol 
 
 3.3.7.2 Unconditional Branch Instruction 
 
 FORM: 
 
 BC TRUE, <true-option> eol 
 ACTION : 
 
 Causes the <true-option> to be executed exactly as if the 
 instruction was a normal BC instruction whose parameter comparison 
 was TRUE. 
 EXAMPLE : 
 
 be true, looplab eol 
 
28 
 3.3.7.3 Attribute-Checking BC Instruction 
 FORM : 
 
 Same as the normal BC instruction, except that 
 
 <relation-type> ; :=MA.SK, <mask-type> 
 
 <mask-type> : :=NOTANY | NOTALL | AM \ ALL 
 ACTION : 
 
 Most context-sensitive language requirements can be viewed as 
 "attributes" of the particular tokens (both pre-defined and user-defined 
 tokens) used in a user's program. In this compiler system, each symbol- 
 table field contains 12 bits; although some of the symbol-table fields 
 have very specific builtin uses (i.e., PDN for pre-defined symbols, and 
 CLASS for both pre-defined and user-defined tokens), some of the remaining 
 fields have no builtin use (for example, the UDN field for user-defined 
 tokens). It is suggested that the language designer select an unused 
 symbol-table field (such as UDN) and let each of the 12 bits in the field 
 represent a different attribute that a user-defined token may have. Specific 
 attribute bits may be turned on or off using the MASKON and MASKOFF 
 instructions (see section 3.3.9). The existence of an attribute for a token 
 can then be checked using the MASK form of the BC instruction. 
 
 The 2 parameters are compared according to the specified 
 <mask-type>. For example, if <jnask-type> is NOTANY, then the comparison 
 is TRUE if NOTANY of the bits that are 1 in <parm2> are also 1 in <parml>, 
 and FAISE otherwise. 
 
29 
 
 Note that it is possible to check for 1 attribute bit being 
 on or off, or any combination of attribute bits being on or off. This 
 allows for example, the grouping of two attributes like "FIXED and "FLOAT" 
 together for certain types of tests (like the attempted declaration of an 
 attribute "CHARACTER"); it may not be important which of the grouped 
 attributes conflicts, but simply that a conflict exists. 
 
 The compiler's automatic error analysis system views the MASK 
 form of the BC instruction as specifying an attribute check of the ciarrent 
 token being examined by the parser. It is possible to give each particular 
 bit-mask that is used as a <parm2> in a BC MASK instruction a unique error 
 print name (see section 3.2.7); this print name will then be used in any 
 generated diagnostic messages that involve the bit mask. 
 
 If a hand-coded error system is used, appropriate unique Error 
 Numbers must be used as in a normal BC instruction. 
 EXAMPLES : 
 
 Assume that at some point in the syntax specification, the only 
 valid syntax option is a numeric declared variable. Then if 
 
 dclvar : : = a constant whose value is the CLASS for a user declared 
 
 variable, and 
 num : : = a constant whose value is the bit-mask for the numeric 
 attribute (s ) , 
 
30 
 the following instructions perform the required check: 
 
 be ne, class, dclvar, error 1 Mclvar required here... 
 
 be mask, notany, udn, num, error 2 ■'^numeric-type required. 
 
 ( 
 As another example, assume that a new user identifier is being declared. 
 
 Let 
 
 varattrib : : = accumulated attribute bit-mask for new identifier, and 
 conflict : : = the conflicting attribute bit-mask for a new attribute 
 the user is trying to add for the identifier. 
 
 The following instruction check the validity of the new attribute: 
 
 be mask, any, varattrib, conflict, error 3 "'^attributes conflict, 
 
31 
 
 3-3-B SEMA Instruction 
 FORM : 
 
 SEMA <seina-nuin'ber> [(<pann> {, <pann>})] eol 
 ACTION : 
 
 Occasionally certain unique, non-standard operations must be 
 performed by the parser. The SEMA instruction allows a language implementor 
 to write a regular TUTOR unit to perform these operations, and then have the 
 parser execute these TUTOR units at appropriate times. 
 
 <sema-number> must be a constant or a mnemonic defined constant, 
 between 1 and 15- The language implementor supplies TUTOR units named 
 SMI to Sml5 for the compiler. Upon execution of the SEMA instruction in the 
 syntax table, the parser will do the correspondingly numbered TUTOR unit. 
 After the TUTOR unit is finished, the parser resumes parsing with the next 
 instruction in the table. 
 
 Up to 5 parameters may be passed to semantic routines (note that 
 the assembler performs no check for inconsistent number of arguments for 
 different uses of a particular semantic routine number). 
 
 To use the parameters in the TUTOR unit: 
 
 The parameters are passed as addresses into the parser storage 
 
 environment through the use of 5 specially located variables in the parser 
 
 storage: they are located at parser storage locations (ps_prm + i), where 
 
 i is the parameter's number (1-5) and ps_j)rm is a compiler system defined 
 
 constant. 
 
 Therefore, to use the address of the argument passed 
 
 through parameter i, reference : ps (ps_prm + i). This address is 
 
 some location in the parser storage environment (for example, a 
 
 particular symbol-table field for the current token in the parser). 
 
32 
 
 To use the value of the argument passed through parameter i, refer- 
 ence: parm(i) which is defined in the compiler as ps(ps(ps_prm + i)). 
 The only exception to the above is that constants (or mnemonic 
 . defined constants) passed as parameters are passed as just the 
 value of the constant (i.e., reference this value as ps(ps_prm + i)). 
 It is up to the language implementor to know and keep track of which 
 parameters in a semantic routine are passed as constants and which 
 are passed as addresses, and to specify the parameters consistently 
 [ for each routine. 
 EXAMPLES : 
 
 sema getdopev (udstp, s t_dvl ( uds tp ) ) eol 
 sema opendblk eol 
 sema k eol 
 
 RESTRICTIONS ON THE USE OF SEMANTIC ROUTINES: 
 
 There are a few restrictions that must be placed on the use of semantic 
 
 routines: 
 
 (l) Tracing of any changes made to parameters passed as addresses: 
 In order to allow the compiler to properly "backup" if the user 
 edits the program being written (since this is an interactive compil- 
 ing environment), anytime that the value of an address in the parser 
 storage environment is changed, the old value must first be traced 
 using the compiler unit TRACE, which has as its one argument the 
 address to be changed. For example, if semantic routine parameter 
 number 2 is passed as an address, and the semantic routine decides 
 to change the value at that address, the following TUTOR code is needed: 
 
33 
 
 do trace (ps(ps_prm +2)) $$ trace old value 
 calc parm (2) ♦- 'the new value' 
 
 • • • 
 (2) Handling of syntactic/semantic errors detected within a semantic 
 routine : 
 
 If an error is detected in a semantic routine, it is not permitted 
 for the semantic routine TUTOR unit itself to execute a transfer 
 of control from the parser to the error analysis system. Instead, 
 all exits to the error system must come through having the parser 
 execute a BC instruction that has a <true-option> of the EEIROR form 
 (see section 3 .3. 7 of this paper). 
 
 The easiest way to do this for an error that is detected with- 
 in a TUTOR semantic unit (note that this type of error checking in 
 a TUTOR semantic unit is very non-standard--nearly all detectable 
 syntactic/semantic errors can be detected through the use of appropri- 
 ate BC testing instructions) is to use a temporary variable TEMPI 
 (see section 3.^.3.5 of this paper) that is returned from the TUTOR 
 unit as either (everything is ok), or non-zero (error detected — 
 the non-zero value can be an appropriate Error Number), and then the 
 TEMP variable can be checked in the instruction following the SEMA 
 instruction: 
 
 • • • 
 
 sema some -number (some -parameters) eol 
 
 be ne, tempi, 0, error tempi Ogives proper error number 
 
 •^for hand-coded error system. 
 
31+ 
 
 3) Variables that may be referenced within a TUTOR semantic routine: 
 
 Any parser storage address that must be referenced within a TUTOR 
 semantic routine unit must be passed through the parameter list. 
 Although this is the only way to reference an ALLOCATED variable 
 in the Syntax Specification, this restriction also includes the 
 special parser storage locations like PDN, CLASS, UDN, PDSTP and 
 UDSTP, even though these locations are also defined directly 
 within the compiler system itself (see section 3.^.3 of this paper 
 for a description of these special locations). 
 
 This restriction is imposed by the compiler's automatic 
 error analysis system. 
 k) Modifying a special parser storage location (section 3.^.3) in a 
 semantic routine requires some care by the language implementor. 
 Since the special locations are actually just duplicate, easily 
 referencable copies of some of the fields in the symbol table 
 entry for a token, any changes to either of the two corresponding 
 locations should be accompanied by a change to the other location 
 also. Note that only the symbol-table fields' values need to be 
 traced, and not the special locations. 
 
 3.3.9 ASSIGN, MASKON, MASKOFF, ADDIT, SUBIT Instructions 
 FORMS : 
 
 ASSIGN <parml>, <parm2> eol 
 
 MASKON <parml>, <parm2> eol 
 
 MASKOFF <parml>, <parm2> eol 
 
 ADDIT <parml>, <parm2> eol 
 
 SUBIT <parml>, <parm2> eol 
 
35 
 ACTION : 
 
 Each of these instructions is used to change the value of the 
 parser storage location for <p£Lrml> to <parm2>, or some function of 
 <parnil> and <parm2>. 
 
 The <parm>s are described in section 3.^ of this thesis. 
 ASSIGN : 
 
 Sets the value of <parml> to the value of <parm2>. 
 MASKON, MASKOFF : 
 
 Sets (on, off) all bits in <parml> corresponding to I's in 
 <parm2>; does not change bits in <parml> corresponding to O's in <parm2>. 
 ADDIT, SUBIT : 
 
 (Adds, subtracts) the value of <parm2> (to, from) the value of 
 <parml>. 
 
 Each of these instructions will trace the old value of <parml> 
 before executing the instruction (except for the TEMP variable, and also 
 PDN, CLASS, UDN, UDSTP, PDSTP variables, which do not need to be traced 
 (see sections 3- ^.3.1 - 3«^.3.^ for more details)). 
 IMPORTANT NOTE ; 
 
 If <parml> is CLASS, UDN, PDN, then both the special parser 
 storage location and the corresponding symbol-table field are modified 
 (see section 3.^.3.2 - 3.^.3.^ for more details). 
 EXAMPLES : 
 
 assign class, dclvar eol 
 addit numsubs, 1 eol 
 
36 
 
 3.^ Description of Valid Parauneters Used in Action Instructions 
 Most of the Parser Action Instructions have one or more 
 <parm>s, that is they have "parameters" or "operands" associated with 
 them (specifically, BC, CALLI, CALL, SEMA, ASSIGN, MASKON, MASKOFF, ADDIT 
 SUBIT). This section documents the form and uses of the different 
 <parm>s that are available in the paxser environment. 
 
 3.^.1 Numeric Constants 
 
 Numeric (integer) constants or mnemonic DEFINEd constants are 
 legal parameters (except as <parml> of a BC (see section 3.3.7) or an 
 auxiliary environment -changing (section 3.3.9) instruction). The constant's 
 value is packed directly into the parser table. The only illegal constant 
 value is ^095 (octal o7777)j which is reserved for use by the compiler's 
 automatic error analysis system. 
 
 3.)4.2 ALLOCATED (Global and Local) Variables 
 
 GLOBAL : Global variables are legal parameters anyplace in the 
 
 Syntax Specification. The parser storage direct address 
 of the Global variable (known at assembly time) is packed 
 into the parser table. 
 
 ALL GLOBAL variables must be ALLOCATEd at the beginning 
 of the Syntax Specification (directly following any 
 
 DEFINE instructions) (see section 3.2.6). 
 
 LOCAL: Local variables are legal parameters any place within 
 the FROC - END block in which they are ALLOCATEd. An 
 
37 
 
 indexed parser storage address (relative to the 
 
 parser's variable storage stack) is packed into 
 
 the parser table. LOCAL variables must be ALLOCATED 
 
 at the beginning of the particular PROC - END block 
 
 in which they are active; note that a PROC's parameters 
 
 are implicity ALLOCATEd Local variables (see section 
 
 3.2.6). 
 
 3.^.3 Pre-defined Parser Variables 
 
 There are a number of pre-defined parser storage variables that 
 can be tested or otherwise used as legal pareuneters anywhere in the Syntax 
 Specification. In all cases, the parser storage direct address (known 
 prior to and during assembly time) is packed into the parser table. 
 
 3.^.3.1 PDSTP, UDSTP: Pre-defined and User-defined Symbol 
 Table Pointers 
 
 In this compiler system, the symbol-table is logically divided 
 into 2 parts: one part consists of all of the pre-defined tokens that 
 belong to the language being implemented (i.e., the reserved(or unreserved) 
 keywords, punctuation symbols, operators, etc.); the second part of the 
 symbol table consists of any tokens that a user may have used in writing 
 a program and that either do not have a corresponding pre-defined entry, 
 or else are used in a context that is different from that of the correspond- 
 ing pre-defined entry, (for example, a declared variable "IF" in PL/1). 
 
38 
 
 The PDSTP and UDSTP variables always contain the values of the 
 appropriate symbol-table pointers for the current token that the parser has 
 received from the lexical analyzer. If the current token has a pre-defined 
 and a user-defined symbol table entry, then PDSTP and UDSTP point to these 
 entries, respectively. If the current token has only a pre-defined entry, 
 then both PDSTP and UDSTP point to this pre-defined entry. If the current 
 token has only a user-defined symbol entry, then UDSTP points to this entry 
 and PDSTP is essentially null (it points to an empty pre-defined symbol- 
 table entry that no token can ever resolve to). 
 
 Note that the only way for a token to have both a pre-defined 
 and a user-defined symbol-table entry is for the language implementor to 
 specifically provide an appropriate SEMAntic routine (see section 3.3.8) 
 that actually creates the user-defined entry from the pre-defined entry; 
 the compiler's symbol-table manager will not create a user-defined entry 
 automatically for a token that resolves to a pre-defined location. 
 
 See section 3.^.^.1 for a description of how to reference 
 particular symbol-table fields, given UDSTP or PDSTP. 
 
 3.^.3.2 CLASS : The syntactic/semantic class of the 
 current token 
 
 The CLASS variable is defined as ST_TYP (UDSTP) (see section 
 
 3.^.4.1). For pre-defined tokens, CLASSes will usually be things like 
 
 "statement keywords", "relational operators", "attribute keywords", etc. 
 
 For user-defined tokens, CLASSes will be things like "declared variable", 
 
 "labels", "undeclared variable", etc. These class values are so commonly 
 
 referred to in parsing a language that the parser maintains a special 
 
39 
 
 parser storeige location that contains the CIASS of the current token that 
 is being examined. 
 
 If the current token has only a pre-defined symbol-table entry, 
 then CIASS is set to the ST_TYP field of this pre-defined entry. If 
 the current token has a user-defined symbol-table entry (or both a pre- 
 defined and a user-defined entry), then CLASS is set to the ST_TYP field 
 of this user-defined entry. 
 
 Note that the CLASS of a user-defined token may be changed 
 and updated through the use of any of the auxiliary instructions (see 
 section 3.3.9) • If the lexical analyzer accumulates a "new" token, 
 that is, a token that has no symbol-table entry, then the symbol-table 
 manager will automatically create a new user-defined symbol-table entry 
 for the new token, and the CLASS (ST_TYP) field of the new entry will be 
 set to the default CLASS value specified by the lexical analyzer. 
 
 Note that all CLASS values used in a particular language 
 implementation should be given CLASS NAMEs for the compiler's automatic 
 error analysis system (see section 3.2,7). 
 
 3.i+.3.3 FDN: Pre-defined Number 
 PDN is a unique identification number for a pre-defined token. 
 The FDN variable is defined as ST_IDN (PDSTP) (see section 3.U.i+.l for a 
 description of symbol-table fields). Each token that is entered in the 
 pre-defined symbol-table by a language implementor should be given an 
 identification number that can be checked by the parser (using BC instruct 
 tion, section 3.3.7) when a particular pre-defined token is a valid parse 
 option for the current parser State and parser environment. The same 
 
ko 
 
 identification number may be given to more than one pre-defined token to 
 allow for pre-defined synonyms or abbreviations (such as "DECLAEE" and 
 "DCL" in PL/I). 
 
 Note that EDN is always based on PDSTP, so if no pre-defined 
 symbol-table entry exists for the current token being examined, the 
 value of EDN is null, that is, it will match nothing. 
 * 
 
 3.^.3.^ UDN: User -de fined Numbe r 
 
 ( 
 
 UDN is the value of ST_IDN (UDSTP), which does not have a pre- 
 
 reserved meaning in the symbol-table (that is, it is available for use 
 
 by a language impleraentor in whatever way is desired). 
 
 ITie UDN variable (i.e., the ST_IDN (UDSTP) symbol-table field) 
 
 is best used as an attribute field for user-defined tokens. Each bit in 
 
 the field (there are 12 of them) can be used to denote a particular 
 
 attribute in the programming language that a user -defined token may assume. 
 
 These attribute bits can be turned on or off using the MA.SKON and MA.SKOFF 
 
 auxiliary instructions; also the attributes of a particular token can be 
 
 tested for consistency using the BC MASK form of the BC instruction. See 
 
 section 3.3.7 for a more complete discussion of the handling of attributes 
 
 by the parser. 
 
 3.^.3.5 TEMP : Used as temporary computation variables only 
 There are 5 temporary variables available for use by the 
 language implementor: TEMPI, TEMP2, TEMP3, TEMPi+, TEMP5. These variables 
 can be used to temporarily save any value in the parser environment. The 
 most important restriction on the use of these TEMP variables, however. 
 
is that they may NOT be used to save a value if the parser retvirns to 
 the lexical analyzer for a new token: these variables are only valid 
 between returns to the lexical analyzer by the parser. 
 
 The reason for this is that the value changes of these 
 variables are not traced by the parser, so that program editing perform- 
 ed by the user will not properly restore the values to the variables. 
 The variables are most useful for returning error indicators from SEMAantic 
 routines . 
 
 3.i+.3.6 BLOCK : 
 Contains the current symbol-table block number that is being 
 used by the symbol-table and the parser. 
 
 3.4.3.7 ITPTP : Intermediate Text Parser Token Pointer 
 Contains the current location of the intermediate text pointer. 
 This value is useful for saving information about locations in the inter- 
 mediate text that will be needed when the user executes the program 
 (like "label" locations, or Subprogram entry points, etc.). 
 
 3.4.4 Table References 
 
 There are two tables in the parser environment that may be 
 accessed as general parameters: the symbol-table and the block-structure 
 table. Assembler references to these tables all follow the same general 
 form: 
 
h2 
 
 FIELD-NAME (<parmx>) 
 where 
 
 FIELD-NAME is the particular table field name, and 
 
 <parmx> is the table Index pointer. 
 The following restrictions apply to <parmx>: 
 
 a) <parmx> may be ALLOCATEd variable (section 3.2.6); 
 
 b) <parmx> may be pre-defined Parser Variable (section 3.^.3); 
 
 c) <parmx> may be a table reference again, but then the para- 
 r 
 
 meter for the new table reference must be either a Global 
 ALLOCATEd variable or a pre-defined Parser Variable only 
 (i.e., at most 2 levels of indexing are allowed). 
 3.i+.U.l Symbol Table Fields 
 Each symbol-table' entry in the symbol-table contains 10 different 
 fields; in addition, a dope-vector symbol-table entry may be associated 
 with a regular symbol-table entry through the use of the ST_DVL fields 
 in the regular entry (see the discussion of the ST_DVL field below); 
 these dope-vector entries contain 5 fields. 
 
 ST_TYP: This field is used to contain the syntactic type for 
 the token. For user-defined tokens, that is, those tokens which are 
 accumulated by the lexical analyzer and that initially have no symbol- 
 table entry, the symbol-table manager in the compiler will assign a 
 symbol-table entry and will initialize this ST_TYP field to a value 
 supplied by the lexical analyzer. 
 
 This is so important to the operation of the parser that a 
 special pre-defined parser storage variable has been provided to hold 
 the ST_TYP of the current token being examined by the parser. This 
 special field is the CLASS field; see section 3«^'3.2 of this paper for 
 
1*3 
 
 more information about the CLASS pre-defined location. 
 
 ST_IDN: For pre-defined symbol-table entries, this field 
 contains a unique identification number for the pre-defined token. This 
 ST_IDN number is so important that a special pre-defined parser storage 
 location has been provided to hold the ST_IDN number for the current token 
 being exajnined by the parser. This special field is the PDN field; see 
 3.^.3.3 of this paper for more information about the PDN pre-defined 
 location. 
 
 For user-defined symbol-table entries, the ST_IDN field does 
 not have a pre-reserved meaning in the symbol-table; therefore, a language 
 iraplementor may use the field in whatever way it desired. However, it is 
 strongly suggested that this field be used as an attribute field for the 
 user-defined tokens (section 3 ♦3. 7 of this paper discusses more completely 
 the handling of attributes by the parser system). The special pre-defined 
 parser storage variable UDN has been provided to hold the ST_IDN value for 
 user-defined tokens (section 3. ^•3.^). 
 
 ST_OFF: 
 
 ST_LEN: These 2 fields in the symbol-table have no pre-reserved 
 meaning, and a language implementor may utilize them in whatever way is 
 desired (for appropriate tokens, these fields should be used for the 
 offset and length of storage at runtime). 
 
 ST_BLK: This field is unused for pre-defined symbol-table 
 entries. For user -defined entries, this field contains the block n^umber 
 of the inner-most block where the corresponding token was first used; this 
 number can be used to access the parser's Block Tables (section 3.^.^.2). 
 
ST_SIB: This field is used to link together all user -defined 
 symhol-table entries in the same Block. 
 
 ST_LNK: The field is used to link together all symbol-table 
 entries, regardless of what Block they are in. 
 
 ST_PDE: This field points to the pre-defined symbol-table 
 entry for a token; if no pre-defined entry exists, it points to a special 
 "null" pre-defined symbol-table entry. 
 
 ST_NTP: This field points to the NAME table entry for the 
 token. Note, that the NAME table itself is not considered part of the 
 parser environment, and is thus not accessible directly as a parameter 
 (however, a SEM/Vntic routine may reference the NAME table fields). 
 
 ST_DVL: This field is unused for pre-defined symbol-table 
 entries, and also for user-defined entries that have no corresponding 
 dope vector entry. 
 
 If a user -defined symbol-table entry requires a dope vector, 
 the language iraplementor must provide a SEMAntic routine (section 3.3.8) 
 that will get a dope vector entry from the symbol-table manager and then 
 set ST_DVL to point to this dope vector entry. Then any dope vector 
 field can be referenced indirectly through this ST_DVL field. 
 
 Dope Vectors: A Dope Vector contains these fields: ST_DIM, 
 ST_LB1, ST_LB2, ST_UB1, ST_UB2. It is very important to remember that a 
 Dope Vector is only available for a token if it has been explicitly 
 requested (see ST_DVL above). Then the Dope Vector fields must be 
 referenced indirectly through the regular symbol-table entry's ST_DVL 
 field. Note that the following definitions of the Dope Vector fields 
 
k3 
 
 are actually only suggested; a language implementor may use the fields 
 in any way that is desired. 
 
 ST_DIM: Contains the number of dimensions for an array. The 
 niimber can be either 1 or 2. 
 
 ST_LB1: 
 
 Contains the lower bounds of the dimensions of an array. 
 
 ST_LB2 
 ST_UB1 
 ST IIB2 
 
 Contains the upper bounds of the dimensions of an array. 
 
 3.U.i^.2 Block Table Fields 
 
 The compiler ' s symbol-table and symbol-table manager were 
 designed to allow normal block-structuring with respect to user-defined 
 tokens to be possible. ■ For this purpose, two block structure tables, 
 referenced as 
 
 BT_LNK and BT_KID 
 are included as part of the parser environment. Both of these tables 
 axe indexed by an appropriate Block number, usually contained in the 
 parser variable BLOCK (section 3.^.3.6). 
 
 The BT_KID table entry for a Block consists of a pointer to 
 a symbol-table entry for a token that has been declared by the user 
 in that block; then the rest of the symbol-table entries also in the same 
 block are chained together through the ST_SIB field in the normal symbol- 
 table entries. A zero ST_SIB field ends the chain. 
 
 The BT_LNK table entry for a Block contains the number of 
 the block containing the current block. This information can be used 
 to find the outer block declarations of a najne. It is also useful for 
 
maintaining correct nesting of variable definitions at runtime. 
 
 The language implementor has control over the opening and 
 closing of blocks. To (open, close) a Block, it is necessary to 
 provide compiler units (blkbgn, blkend) to be executed in TUTOR. These 
 units will change the current value of BLOCK (section 3.^.3.6) and 
 perform other appropriate modifications for the desired action. 
 EXAMPLES : 
 
 The following are all legal table references; the references to 
 the dope vector fields assumes that a dope vector has been allocated in 
 the symbol-table "^or the token (see discussion above on ST_DVL field). 
 
 (udstp) , corresponds to CLASS. 
 
 (pdstp) , corresponds to PDN. 
 
 (udstp) , corresponds to UDN. 
 
 (udstp) 
 
 (udstp) 
 
 (udstp) 
 
 (udstp) 
 
 (st_dvl( udstp) ) 
 
 (st_dvl( udstp) ) 
 
 (block) 
 
 (outerblk) , where outerblk is an ALLOCATEd variable 
 
 whose value is a valid block number, 
 (var) , where var is an ALLOCATEd variable whose value 
 is the symbol-table pointer (udstp) for a token, 
 
 st_ 
 
 _typ ( 
 
 st_ 
 
 idn ( 
 
 st_ 
 
 _idn ( 
 
 st_ 
 
 _off ( 
 
 st_ 
 
 _len ( 
 
 st_ 
 
 _blk ( 
 
 st_ 
 
 _dvl ( 
 
 st_ 
 
 dim ( 
 
 st_ 
 
 _ub2 ( 
 
 bt_ 
 
 _kid ( 
 
 bt 
 
 kid ( 
 
 st typ 
 
U7 
 
 CHAPTER k. 
 k, THE PARSER TABLE INSTRUCTION FORMS 
 k.l Notation 
 
 This chapter will describe the actual instruction forms that 
 appear in the syntax parser table. It is these instruction forms that 
 are exsunined and interpreted by the parser in the compiler to determine 
 whether a user's program is syntactically and semantically correct. 
 
 The basic instruction size, like the word size in the parser 
 storage area, is 12 bits; this chapter will refer to these 12 -bit packages 
 as "words". Some instructions require exactly 1 word in the table; others 
 require exactly N words, where N>1; and some instructions require a 
 variable number of words, depending on the value of fields within the 
 initial words of the particular instruction. 
 
 The following notation will be used on the following pages: 
 [state]: state number, points to an instruction word location 
 
 somewhere in the syntax table (examples are [call-state], 
 [return-state], [true-state] ). 
 <parm>: an instruction parameter or operand. A <parm> is either 
 a number (numeric constant) packed directly in the 
 table, or else the address of a variable in the parser 
 storage area. Thus a <parm> can take 1 word (for 
 numeric constant packed in the syntax table, or a 
 direct address of a number in the parser storage 
 area), or 2 words (an indexed address of a number in 
 parser storage), or 3 words (for a doubly-indexed 
 address of a variable in the parser storage area) . 
 
k8 
 The forms of the <parm>s used in particular instructions 
 are determined by the actual instruction numbers (op codes), 
 
 ^.2 The Table Instructions 
 
 U.2.1 SCM Table Instruction 
 TABLE FORM : 
 
 /OOOQOOOQQOOO/ 
 ACTION : 
 
 Sets the parser's STATE variable to point to the following 
 instruction in the table, and returns to the lexical analyzer for another 
 token. When another token has been input to the lexical analyzer, the 
 symbol-table manager determines the symbol-table location(s) for the new 
 token and parsing resumes with the saved STATE instruction. 
 
 1+.2.2 ALLOCATE Table Instruction 
 TABLE FORM : 
 
 /dddddddO-OOOl/ 
 ACTION: 
 
 Pushes ddddddd new entries on the parser's variable stack. No 
 initialization of the values of these entries is performed; the stack pointer 
 is merely incremented. 
 
 1^.2. 3 DEALLOCATE Table Instruction 
 TABLE FORM : 
 
 /dddddddOOOlO/ 
 
^9 
 
 ACTION; 
 
 Pops ddddddd entries off of the parser's variable stack. The 
 value of each entry that is popped off is traced, and the stack pointer is 
 decremented. 
 
 k,2.k Call Table Instruction 
 
 TABLE FORM: 
 
 /dddddddOOOll/ 
 /xxxxxxxxxxxx/ 
 /yyyyyyyyyyyy/ 
 
 word 1 
 word 2 
 word 3 
 
 to 
 
 ^ 
 
 : Optional 
 
 / yyyyyyyyyyyy/ word 3 + ddddddd - iJ 
 
 ACTION : 
 
 xxxxxxxxxxxx : [call-state] table location. 
 
 ddddddd : number of multiple return points for the called 
 procedure. If ddddddd = 0, then the procedure 
 is normal (not multiple return). 
 
 yyyyyyyyyyyy : the multiple return table locations (if any). 
 Pushes the table location for word 3 onto the parser's return-state 
 stack. Then resumes parsing immediately at the table location [call-state]. 
 See section U.2.5 for a discussion of the actions that occur when a 
 procedure is returned from via a RET instruction. 
 
 Note that any arguments that are passed into the call-procedure are 
 passed by using ASSIGN instructions immediately proceeding the CALL 
 instruction (see section i|.2.8.3 for a discussion of the ASSIGN instruction). 
 
50 
 i^.2.5 RET Ta."ble Instruction 
 TABLE FORM : 
 
 /dddddddOOlOO/ 
 
 ACTION : 
 
 Causes a return from the current procedure to where ever it was 
 called from (see section k.2.k for a description of the CALL instruction). 
 
 Pops the return-address table location off of the parser's stack; 
 this location corresponds to the work in the CALL instruction that follows 
 the [call-state] number. 
 
 If ddddddd = 0, then the procedure does not use the multiple- 
 return feature, so the popped address corresponds to the location of 
 the instruction that follows the original CALL instruction. Therefore, 
 parsing is resumed immediately at this location. 
 
 If ddddddd> 0, the procedure does use the multiple return feature, 
 and ddddddd is the number of the multiple return address to use. For this 
 case, the multiple return addresses are all packed directly in the parser 
 table following the CALL instruction's [call-state! number; the return 
 address table location that was popped off of the parser's stack points 
 to the first of these multiple return addresses. Therefore, the ddddddd 'th 
 multiple return address is selected from the parser table, and parsing 
 resumes immediately at this address. 
 
 Note that when the parser's stack is popped, the old entry 
 at the top of the stack, as well as the stack pointer itself, are traced. 
 
 i 
 
51 
 
 k.2.6 SEMA Table Instruction 
 TABLE FORM : 
 
 /dddddddOOlOl/ 
 ACTION : 
 
 Causes the ddddddd'th TUTOR-coded semantic routine (supplied by 
 the language Implementor for each language) to be executed. The semantic 
 routines are named Sml, Sm2, ..., Sml5. 
 
 Any parameters for the semantic routine are passed In the "parm" 
 parser storage variables (see section 3. 3 .8) by using the appropriate 
 PASSION Instruction (section ^+.2.8.3) Immediately preceding the SEMA 
 instruction. 
 
 k.2.7 Unconditional Branch Table Instruction 
 TABLE FORM ; 
 
 /mmOOOOOOOllO/ word 1 
 
 / [true -option] / word 2 (and possibly word 3) 
 
 ACTION: 
 
 Causes an unconditional interpreting of the [true-option] field, 
 based on the value of mm: 
 
 mm = : [true-option] is an instruction table location; for this 
 
 case, parsing resumes immediately at this new location. 
 mm = 1 : [true -opt ion] is an error number; for this case, control 
 passes from the parser to the error system, with this 
 error number. 
 
52 
 
 mm = 2 : [true-option] is the direct address in parser storage 
 
 of an error number; control passes to the error system 
 
 with the value of this error number. 
 mm = 3 : [true-option] is the indexed address in parser storage 
 
 of an error niimber; control passes to the error system 
 
 with the value of this error number. 
 
 U.2.8 General Parameter Table Instructions 
 
 i+.2.8.1 General Instruction Form 
 TABLE FORM ; 
 
 /mmcccccppppp/ word 1 
 
 / table parameter 1 . / 1, 2, or 3 words 
 
 / table parameter 2 / 1, 2, or 3 words 
 
 / [true-option] j 1, or 2 words, only for 
 
 conditional branch instructions, 
 ACTION ; 
 
 This instruction form is used for all instructions that use 
 2 parameters as operands. 
 
 PPPPP tells what the 2 parsuneter table forms look like: 
 aa = 7 J ai = 8, a(ii) = 9? ac = 10, 
 ia = 11, ii = 12, i(ii) = 13, ic = lU, 
 (ii)a = 15, (ii)i = l6, (ii)(ii) = 17, (ii)c = l8. 
 
53 
 
 where 
 
 a : direct address is parser storage (l word) 
 
 i : indexed address in parser storage (2 words) 
 ii : doubly-indexed address in parser storage (3 words) 
 
 c : table constant packed in the peirser table itself (l word). 
 Based on the value of ppppp, the 2 parameters are decoded into both their 
 addresses and their values; for this discussion let the 2 parajneters be 
 denoted as pi and p2, and the decoding yields: 
 
 val(pl) and addr(pl) and 
 
 val(p2) and addr(p2). 
 These 2 parameters are then used according to the value of ccccc: 
 
 bceq = 0, bene = 1, bcgt = 2, bcge = 3? belt = k, bcle = 5? 
 
 bcnotall = 6,- bcnotany = t, bcall = 8, beany = 8, 
 
 assign = 10, passign = 11, maskon = 12, maskoff = 13, 
 
 addit = ik, subit =15. 
 The BC table instructions are described in section ^.2.8.2, and the 
 environment -changing instructions are described in section ^+,2,8.3. 
 
 ^.2.8.2 C^onditional Branch BC Table Instructions 
 ACTION ; 
 
 Causes the comparison of the values of 2 parameters, X = val(pl), 
 Y = val(p2). 
 This chart describes the TRUE condition requirements for each ccccc: 
 
51^ 
 
 ccccc 
 
 condition 
 
 
 
 bceq 
 
 1 
 
 bene 
 
 2 
 
 bcgt 
 
 3 
 
 bcge 
 
 1+ 
 
 belt 
 
 5 
 
 bele 
 
 6 
 
 bcnotall 
 
 7 
 
 bcnotany 
 
 8 
 
 be all 
 
 9 
 
 beany 
 
 Condition TRUE if 
 X = Y 
 X ^ Y 
 X > Y 
 X > Y 
 X < Y 
 X < Y 
 
 (( X $mask$ Y) ^ Y ) 
 ((X $mask$ Y) = ) 
 (( X $raask$ Y) = Y ) 
 (( X $mask$ Y) / ) 
 where "$mask$" performs the bit-wise "AND" of X and Y. 
 If the comparison of the 2 parameters yields FALSE, then the [true-option] 
 is ignored, and parsing resumes with the next instruction in the table. 
 If the comparison of the 2 parameters yields TRUE, the [true-option] 
 is interpreted as follows: 
 
 mm = : [true-option] is an instruction table location; for this 
 
 case, parsing resumes immediately at this new location, 
 mm = 1 : [true-option] is an error number; for this ease, control 
 passes from the parser to the error system, with this 
 error number, 
 mm = 2 : [true-option] is the direct address in parser storage of 
 an error number; control passes to the error system, with 
 the value of this error number, 
 mm = 3 : [true-option] is the indexed address on parser storage of 
 an error number; control passes to the error system with 
 the value of this error number. 
 
55 
 
 U.2.8.3 Parser Environment -Chajiglng Table Instructions 
 
 ACTION: 
 
 All of these instruction forms involve changing or modifying 
 the value of the first parameter in the parser storage area. The follow- 
 ing chart summarizes the actions of the different instructions: 
 
 ccccc 
 
 instruction 
 
 10 
 
 assign 
 
 11 
 
 pas sign 
 
 12 
 
 maskon 
 
 13 
 
 maskoff 
 
 ll+ 
 
 addit 
 
 15 
 
 sub it 
 
 action 
 
 val(pl) -val(p2) 
 
 val(pl) ^addr(p2) 
 
 val(pl) ^val(pl) $union$ val(p2) 
 
 val(pl) *-val(pl) $mask$ (-val(p2)) 
 
 val(pl) *-val(pl) + val(p2) 
 
 val(pl) ^val(pl) - val(p2) 
 
 where "$mask$" is the bit-wise "AND", "$union$" is the bit-wise "OR", ' 
 and the (-val(p2)) for the maskoff instruction is the bit-wise complement 
 of val (p2). 
 
 Before any of these instructions are executed by the parser, the 
 old value of parameter 1 is traced if necessary (see section 3.3.9 for 
 exceptions). 
 
 Note that the only current use of the PASSION table instruction 
 is for passing parameters to semantic routines; there is no assembler 
 source form of the PASSION instruction. • 
 
56 
 
 The following are some illegal table references: 
 st_idn (st_dvl(var) ) ,where var is a local ALLOC AT Ed variable. 
 st_typ(l) , constants are Not allowed in current version. 
 st_ub3 (udstp) , there is no st_ub3I 
 
57 
 CHAPTER 5. 
 5. THE COMPILER'S TABLE MAINTENANCE SYSTEM 
 
 5. 1 Maintenance System's Purpose 
 
 Included as part of the compiler system that has been implemented 
 on PLATO rv is a general compiler's table maintenance system. This 
 maintenance system is designed to allow language implementors to completely 
 specify all of the tables that are required for a particular language to 
 be recognized and used as part of the computer science compiler system. 
 The maintenance system also allows changes to be made and tested to exist- 
 ing "stable" versions of the compiler system tables without disturbing the 
 "stable" version until the modifications have been throughly debugged. 
 
 The remainder of this chapter will discuss the utilization of this 
 table maintenance system. 
 
 5.2 General Operation of the Maintenance System 
 
 The compiler's table maintenance system maintains a large dataset 
 file that PLATO IV stores on a disk. Each "used" block on the dataset is 
 associated with some particular language implementation for the compiler; 
 all of the compiler tables for a given language are stored within the blocks 
 that are allocated for that language. 
 
 A language implementor is allowed to modify any of the tables 
 that are stored on the dataset for the language that is being implemented. 
 Experimental versions of an existing language are easily created; these 
 new versions are allocated their own disk space, which allows modifications 
 to be made without disturbing the original version. Figure 5.1 shows all 
 of the dataset FILE MANAGEMENT options that are available to a language 
 implementor. Figure 5.2 shows an example of the dataset directory. 
 
58 
 The actual compiler itself utilizes a set of tables that are 
 stored in "common", which is an Extended Core storage file associated 
 directly with the compiler lesson. The table maintenance system allows 
 a language implementor to update the compiler's "common" tables from 
 the copy of the tables that are stored in the dataset. 
 
 Thus, the maintenance system allows a language implementor to 
 completely maintain the tables that are used by the compiler system. 
 
 5.3 Logging into the Maintenance System 
 
 The table maintenance system requires that each language in 
 the dataset be code-word protected. When signing into the maintenance system, 
 the proper code-word must be typed in before the tables for a language may 
 be modified (figure 5*3 illustrates this process). 
 
 After the proper code-word has been entered, the language name ^ 
 must be specified (see figure 5.^). 
 
 Once the language name has been correctly typed in, the 
 language ijuplementor is officially logged into the table maintenance 
 system. At this time, a number of options are available (see figure 5.5) j 
 including editing or assembling the syntax language source text. Access is 
 also allowed to any of the FILE MANAGEMENT options mentioned above (figure 
 5»1). 
 
 Note that the table maintenance system also allows someone to 
 sign into the system without requiring that a code-word be entered; this 
 puts the person in an INSPECT ONLY mode, in which the person may examine 
 any of the tables for a language, but is not allowed to make any change 
 to any language. 
 
59 
 
 
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6k 
 
 3-h Preparing the Syntax Table for the Compiler System 
 
 Once a new language has been created on the dataset, the 
 language implementor then proceeds with the "edit the syntax language 
 source" table builder option; the initial version of the syntax source 
 specification is then typed into the syntax blocks for the language. 
 
 When the syntax specification is complete, the table option 
 "to assemble the syntax language source" should be attempted. This option 
 assembles the source form into the compiler's table form; as the assembler 
 is running, the current label in the syntax source specification is displayed 
 to allow the language implementor to follow the progi^ess of the assembler 
 (see figure 5*6) . 
 
 Any errors in the syntax specification will be flagged as they 
 are detected; no attempt is made by the assembler to correct the error-- 
 the language implementor must return to the table builder, fix the indicated 
 error, and attempt to reassemble the syntax source until no errors are 
 detected by the assembler. 
 
 When a correctly assembled table has been prepared by the 
 assembler, upon returning to the table maintenance system the language 
 implementor should update the copy of the tables on the disk (see figure 5* 7) 
 
 Once the syntax table is prepared, as well as all of the other 
 compiler tables, the table builder option "to jump to the compiler" should 
 be taken to initialize or update the compiler's actual "common" table 
 version (note that this version of. the compiler will also contain the 
 appropriate set of 'TUT(t)R semantic routines for the given language (see 
 section 3.3.8)). Then any logic errors in the syntax specification must 
 b^ discovered and corrected by the language implementor. 
 
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 CHAPTER 6. 
 6. FUTURE DEVELOPMENT 
 
 The table-driven parser system that has been described in this 
 paper works fairly well for the languages that have been implemented thus 
 far (PL/I, FORTRAN, COBOL, BASIC). However, there are a few areas in 
 which improvements could be made within both the actual table system, 
 and the corresponding assembler language specifications. 
 
 One area that could be greatly improved is the handling of . 
 semantic routines in the system (section 3.3.8). When the table-driven 
 system was first designed, very few semantic-type instructions were 
 included (examples are ASSIGN, ADDIT, SUBIT, etc.) because it was not 
 known exactly what instructions would be needed. Now that a number of 
 languages have been implemented, the semantic routines that are used by 
 these languages need to be surveyed very carefully so that the commonly- 
 used routines can be included directly as new instructions in the system 
 (examples might be instructions to open (close) a block, or to request 
 that a dope vector be allocated and linked to a particular symbol table 
 entry). Ultimately, the hope would be to eliminate nearly all actual 
 uses of the SEMA instruction in the system, with the appropriate functions 
 being accomplished more directly. 
 
 A second improvement to the system would be the development of 
 a slightly higher-level form of the assembler language to be used in 
 specifying the syntax/ semantics of a programming language. For example, 
 a simple looping -type construct would be very useful in the assembler. 
 
68 
 
 Another useful addition would be to allow more complicated data-structures 
 to be declared within the Parser's variable stack; for example, it would 
 be useful to be able to easily create and manipulate linked-lists of 
 ALLOCATEd variables on the parser's stack. 
 
 A final improvement, and by far the most difficult one, is to 
 develop a program to convert a BNF-like representation of the syntactic/ 
 semantic requirements for a language into the table-form that is required 
 by the compiler system. Although the most difficult improvement suggested 
 here, this would also be the most useful because it would allow language 
 designers to implement new languages without having a detailed knowledge 
 of the actual parser table system that is used in the compiler. 
 
69 
 
 LIST OF REFERENCES 
 
 [1] Conway, M.E., "Design of a Separable Transition-Diagram Compiler", 
 CACM, Vol. 6, (July I963), PP. 396-^+08. 
 
 [2] Eland, David, Forthcoming Ph.D. thesis on the GUIDE information- 
 retrieval system, to be published in the summer of (1975). 
 
 [3] Lomet, D. B. , "A Formalization of Transition-diagram Systems", 
 Journal of the ACM, Vol. 20, No. 2, (April 1973), PP- 235-257. 
 
 [k] Nievergelt, J., Reingold, E, M. , and Wilcox, T.R., "The Automation 
 of Introductory Computer Science Courses," A. Gunther, et al. 
 (editors). International Computing Symposium 1973? North-Holland 
 Publishing Co., 197^. 
 
 [5] Sherwood, B. A., The TUTOR Language , Computer-based Education 
 Research Laboratory and Department of Physics, University of 
 Illinois, Urbana. 
 
 [6] Tindall, M. H. , Forthcoming Ph.D. thesis on an interactive, 
 
 compile-time table-driven error analysis system, to be published 
 fall (1975). • 
 
70 
 
 APPENDIX 
 
 This appendix contains a sample assembler source language listing for a 
 version of a subset of the PL/I programming language. 
 
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BIBLIOGRAPHIC DATA 
 SHEET 
 
 1. Report No. 
 
 UTUCDCS-R-7'5-7US 
 
 4. Tiilf and Subt it Ir 
 
 An Interactive Table -Driven Parser System 
 
 3. Recipient's Acceaaion No. 
 
 5. Report Datr 
 
 Aijf/ust 197!? 
 
 7. Author(s) 
 
 Michael Harry Tindall 
 
 8- Performing Organization Rept. 
 
 No- IJTnCDC3-R-75-7H5 
 
 9. Performing Organization Name and Address 
 
 University of Illinois at Urbana-Champaign 
 Department of Computer Science 
 Urbana, Illinois 618OI 
 
 10. Proiect/Taslc/Work Unit No. 
 
 11. Contract/Grant No. 
 
 NSF Grant EC-U15II 
 
 12. Sponsoring Organization Name and Address 
 
 IBM Corporation 
 
 Thomas J. Watson Research Laboratory 
 
 Yorktca-^n Heights, New York 10598 
 
 13. Type of Report & Period 
 Covered 
 
 Master of Science Thes 
 
 14. 
 
 15. Supplementary Notes 
 
 National Science Foundation, Wasington, D.C 20550 
 
 16. Abstracts 
 
 The design and implementation of the parser system for a multi-lingual compiler 
 on the PLATO IV computer-aided instructional system is described. A brief 
 discussion of the formal transition diagram parsing method is followed by the 
 description of the assembler language used to specify the syntax of a prograjmning 
 language and the description of the actual parser tables. 
 
 17. Key Words and Document Analysis. 17a. Descriptors 
 
 Compilers, Parser Systems, Table Driven, Interactive Compiling, PLATO IV 
 
 17b. Identifiers/Open-Ended Terms 
 
 17c. COSATI Field/Group 
 
 18. Availability Statement 
 
 Release Unlimited 
 
 19. Security Class (This 
 Report) 
 
 IJ>^ri,ASSIFIF.D 
 
 20. Security Class (This 
 Page 
 
 UNCLASSIFIED 
 
 21. No. of Pages 
 
 90 
 
 22. Price 
 
 FORM NTIS-35 (10-70) 
 
 USCOMM-DC 40329-P71 
 
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