Intermediate code generation
Shashwat [email protected]
Intermediate Code Generation
Translating source program into an “intermediate language.” Simple CPU Independent, …yet, close in spirit to machine language.
Benefits is
1. Retargeting is facilitated
2. Machine independent Code Optimization can be applied.
Intermediate Code Generation Intermediate codes are machine independent codes, but they are close to
machine instructions.
The given program in a source language is converted to an equivalent program in an intermediate language by the intermediate code generator.
Intermediate language can be many different languages, and the designer of the compiler decides this intermediate language.
syntax trees can be used as an intermediate language.
postfix notation can be used as an intermediate language.
three-address code (Quadruples) can be used as an intermediate language
we will use quadruples to discuss intermediate code generation quadruples are close to machine instructions, but they are not actual
machine instructions.
Types of Intermediate Languages
Graphical Representations. Consider the assignment a:=b*-c+b*-c:
assign
a +
* *
uminus uminusb
c c
b
assign
a+
*
uminus
b c
Syntax Dir. Definition to produce syntax trees for Assignment Statements.
PRODUCTION Semantic Rule
S id := E { S.nptr = mknode (‘assign’,
mkleaf(id, id.entry), E.nptr) }
E E1 + E2 {E.nptr = mknode(‘+’, E1.nptr,E2.nptr) }
E E1 * E2 {E.nptr = mknode(‘*’, E1.nptr,E2.nptr) }
E - E1 {E.nptr = mknode(‘uminus’, E1.nptr) }
E ( E1 ) {E.nptr = E1.nptr }
E id {E.nptr = mkleaf(id, id.entry) }
Three Address Code
Statements of general form x:=y op z
No built-up arithmetic expressions are allowed. As a result, x:=y + z * w
should be represented ast1:=z * wt2:=y + t1
x:=t2
Observe that given the syntax-tree or the dag of the graphical representation we can easily derive a three address code for assignments as above.
In fact three-address code is a linearization of the syntax tree. Three-address code is useful: related to machine-language/ simple/
optimizable.
x,y,z- names,constants or compiler-generated temporaries
t1 , t2 – compiler generated temporary names
3 address code for the syntax tree and the daga:=b*-c+b*-c:
assign
a +
* *
uminus uminusb
c c
b
assign
a+
*
uminus
b c
Syntax tree Dag
3-address codes are
t1:=- c
t2:=b * t1
t5:=t2 + t2
a:=t5
t1:=- ct2:=b * t1
t3:=- ct4:=b * t3
t5:=t2 + t4
a:=t5
Syntax tree Dag
Types of Three-Address Statements.
Assignment Statement: x:=y op zAssignment Statement: x:=op zCopy Statement: x:=zUnconditional Jump: goto LConditional Jump: if x relop y goto
LStack Operations: Push/pop
More AdvancedProcedure:
param x1param x2…param xncall p,n
Index Assignments:x:=y[ i ]x[ i ]:=y
Address and Pointer Assignments:x:=&yx:=*y*x:=y
Generated as part of call of proc. p(x1,x2,……,xn)
Syntax-Directed Translation into 3-address code.
Syntax-Directed Translation for 3-address code for assignment statements
Use attributes E.place to hold the name of the “place” that will hold the value of
E Identifier will be assumed to already have the place attribute
defined. For example, the place attribute will be of the form t0, t1, t2, …
for identifiers and v0,v1,v2 etc. for the rest. E.code to hold the three address code statements that evaluate
E (this is the `translation’ attribute). Use function newtemp that returns a new temporary
variable that we can use. Use function gen to generate a single three address
statement given the necessary information (variable names and operations).
Syntax-Dir. Definition for 3-address code
PRODUCTION Semantic Rule S id := E { S.code = E.code||gen(id.place ‘=’ E.place ) }E E1 + E2 {E.place = newtemp ;
E.code = E1.code || E2.code || || gen(E.place‘:=’E1.place‘+’E2.place)
}E E1 * E2 {E.place = newtemp ;
E.code = E1.code || E2.code || || gen(E.place‘=’E1.place‘*’E2.place) }
E - E1 {E.place = newtemp ; E.code = E1.code ||
|| gen(E.place ‘=’ ‘uminus’ E1.place) }E ( E1 ) {E.place = E1.place ; E.code = E1.code}E id {E.place = id.entry ; E.code = ‘’ }
e.g. a := b * - (c+d)
‘||’: string concatenation
while statements
E.g. while statements of the form “while E do S”(interpreted as while the value of E is not 0 do S)
PRODUCTION
S while E do S1
Semantic Rule
S.begin = newlabel;
S.after = newlabel ;
S.code = gen(S.begin ‘:’)
|| E.code
|| gen(‘if’ E.place ‘=’ ‘0’ ‘goto’ S.after)
|| S1.code
|| gen(‘goto’ S.begin)
|| gen(S.after ‘:’)
E.code
If E.place = 0 goto S.after
S1.code
Goto S.begin
S.begin:
S.after:……………….
To mark the 1st stmt. In code for E
stmt. following code S
Implementation of 3 address code
QuadruplesTriplesIndirect triples
Quadruples
A quadruple is a record structure with four fields: op, arg1, arg2, and result The op field contains an internal code for an operator Statements with unary operators do not use arg2 Operators like param use neither arg2 nor result The target label for conditional and unconditional jumps are in result
The contents of fields arg1, arg2, and result are typically pointers to symbol table entries
Implementations of 3-address statements
Quadruples
t1:=- c
t2:=b * t1
t3:=- c
t4:=b * t3
t5:=t2 + t4
a:=t5
op arg1 arg2 result
(0) uminus c t1
(1) * b t1 t2
(2) uminus c
(3) * b t3 t4
(4) + t2 t4 t5
(5) := t5 a
a:=b*-c+b*-c:
Triples
Triples refer to a temporary value by the position of the statement that computes it Statements can be represented by a record with only three
fields: op, arg1, and arg2 Avoids the need to enter temporary names into the symbol table
Contents of arg1 and arg2: Pointer into symbol table (for programmer defined names) Pointer into triple structure (for temporaries)
Implementations of 3-address statements, II
Triples
t1:=- c
t2:=b * t1
t3:=- c
t4:=b * t3
t5:=t2 + t4
a:=t5
op arg1 arg2
(0) uminus c
(1) * b (0)
(2) uminus c
(3) * b (2)
(4) + (1) (3)
(5) assign a (4)
a:=b*-c+b*-c:
Implementations of 3-address statements, III
Indirect Triples
stmt op arg1 arg2
(14) uminus c
(15) * b (14)
(16) uminus c
(17) * b (16)
(18) + (15) (17)
(19) assign a (18)
stmt
(0) (14)
(1) (15)
(2) (16)
(3) (17)
(4) (18)
(5) (19)
t1:=- ct2:=b * t1t3:=- ct4:=b * t3t5:=t2 + t4a:=t5
a:=b*-c+b*-c:
DECLARATIONS
Declarations in a procedure Langs. like C , Pascal allows declarations in single procedure to
be processed as a group A global variable offset keeps track of the next available relative
addresses Before the Ist declaration is considered, the value of offset is set
to 0. When a new name is seen , name is entered in symbol table
with current value as offset , offset incre. by width of data object denoted by name.
Procedure enter(name,type,offset) creates symbol table entry for name , gives it type type ,and rel.addr. offset in its data area
Type , width – denotes no. of memory units taken by objects of that type
SDT to generate ICode for DeclarationsUsing a global variable offsetPRODUCTION Semantic Rule
P D { }D D ; DD id : T { enter (id.name, T.type, offset);
offset:=offset + T.width }T integer {T.type = integer ; T.width = 4; }T real {T.type = real ; T.width = 8}T array [ num ] of T1
{T.type=array(1..num.val,T1.type) T.width = num.val * T1.width}
T ^T1 {T.type = pointer(T1.type);T1.width = 4}
Nested Procedure Declarations
For each procedure we should create a symbol table.
mktable(previous) – create a new symbol table where previous is the parent symbol table of this new symbol table
enter(symtable,name,type,offset) – create a new entry for a variable in the given symbol table.
enterproc(symtable,name,newsymbtable) – create a new entry for the procedure in the symbol table of its parent.
addwidth(symtable,width) – puts the total width of all entries in the symbol table into the header of that table.
We will have two stacks: tblptr – to hold the pointers to the symbol tables offset – to hold the current offsets in the symbol tables in tblptr
stack.
SDT to generate ICode for Nested Procedures
( P M D { addwidth(top(tblptr), top(offset)); pop(tblptr); pop(offset) }
M { t:=mktable(null); push(t, tblptr); push(0, offset)}
D D1 ; D2 ...
D proc id ; N D ; S { t:=top(tblpr); addwidth(t,top(offset));
pop(tblptr); pop(offset);
enterproc(top(tblptr), id.name, t)}
N {t:=mktable(top(tblptr)); push(t,tblptr); push(0,offset);}
D id : T {enter(top(tblptr), id.name, T.type, top(offset);
top(offset):=top(offset) + T.width
Example: proc func1; D; proc func2 D; S; S
SDT to generate ICode for assignment statements
Use attributes E.place to hold the name of the “place” that will hold the value of
E Identifier will be assumed to already have the place attribute
defined. For example, the place attribute will be of the form t0, t1, t2, …
for identifiers and v0,v1,v2 etc. for the rest. E.code to hold the three address code statements that evaluate
E (this is the `translation’ attribute). Use function newtemp that returns a new temporary
variable that we can use. Use function gen to generate a single three address
statement given the necessary information (variable names and operations).
Syntax-Dir. Definition for 3-address code
PRODUCTION Semantic Rule S id := E { S.code = E.code||gen(id.place ‘=’ E.place ) }E E1 + E2 {E.place = newtemp ;
E.code = E1.code || E2.code || || gen(E.place‘:=’E1.place‘+’E2.place)
}E E1 * E2 {E.place = newtemp ;
E.code = E1.code || E2.code || || gen(E.place‘=’E1.place‘*’E2.place) }
E - E1 {E.place = newtemp ; E.code = E1.code ||
|| gen(E.place ‘=’ ‘uminus’ E1.place) }E ( E1 ) {E.place = E1.place ; E.code = E1.code}E id {E.place = id.entry ; E.code = ‘’ }
e.g. a := b * - (c+d)
Boolean Expressions
Boolean expressions has 2 purpose To compute Boolean values as a conditional expression for statements
Methods of translating boolean expression:
(2 methods to represent the value of Boolean expn) Numerical methods:
True is represented as 1 and false is represented as 0 Nonzero values are considered true and zero values are considered
false By Flow-of-control :
Represent the value of a boolean by the position reached in a program
Often not necessary to evaluate entire expression
SDT for Numerical Representation for booleans
Expressions evaluated left to right using 1 to denote true and 0 to donate false
Example: a or b and not ct1 := not ct2 := b and t1t3 := a or t2
Another example: a < b100: if a < b goto 103101: t : = 0102: goto 104103: t : = 1104: …
Emit & nextstat
emit fn.– places 3-address stmts into an o/p file in the right format
nextstat fn.– gives the index of the next 3 - address stmt in o/p sequence
E.place to hold the name of the “place” that will hold the value of E
Production Semantic Rules
E E1 or E2
E.place := newtemp;emit(E.place ':=' E1.place 'or'
E2.place)
E E1 and E2
E.place := newtemp;emit(E.place ':=' E1.place 'and'
E2.place)
E not E1
E.place := newtemp;emit(E.place ':=' 'not' E1.place)
E (E1) E.place := E1.place;
SDT for Numerical Representation for booleans
Production Semantic Rules
E id1 relop id2
E.place := newtemp;emit('if' id1.place relop.op
id2.place 'goto' nextstat+3);
emit(E.place ':=' '0');emit('goto' nextstat+2);emit(E.place ':=' '1');
E trueE.place := newtemp;emit(E.place ':=' '1')
E falseE.place := newtemp;emit(E.place ':=' '0')
SDT for Numerical Representation for booleans
nextstat fn.– gives the index of the next 3 - address stmt in o/p sequence
Example: a<b or c<d and e<f
100: if a < b goto 103101: t1 := 0102: goto 104103: t1 := 1104: if c < d goto 107105: t2 := 0106: goto 108107: t2 := 1108: if e < f goto 111109: t3 := 0110: goto 112111: t3 := 1112: t4 := t2 and t3113: t5 := t1 or t4
Flow of control Stmts S →if E then S1 |
if E then S1 else S2|while E do S1
Here E is the boolean expn. to be translated We assume that 3-address code can be labeled newlabel returns a symbolic label each time its called. E is associated with 2 labels
1. E.true – label which controls flow if E is true
2. E.false – label which controls flow if E is false S.next – is a label that is attached to the first 3 address
instruction to be executed after the code for S
1. Code for if - then
E.code
S1.code
to E.trueto E.false
………..
S →If E then S1
Semantic rules
E.true := newlabel;
E.false := S.next;
S1.next := S.next;
S.code := E.code || gen(E.true ':') || S1.code
E.true:
E.false:
2.Code for if-then-else
S if E then S1 else S2
E.code
S1.code
to E.true
to E.false
Semantic rules
goto S.next
S2.code
E.true:
E.false:
………..S.next
E.true := newlabel;E.false := newlabel;S1.next := S.next;S2.next := S.next;S.code := E.code || gen(E.true ':') || S1.code || gen(‘ goto‘ S.next) || gen ( E.false ‘:’ ) || S2.code
3. Code for while-do
S while E do S1
E.code
S1.code
to E.true
to E.false
Semantic rules
S.begin := newlabel;E.true := newlabel;E.false := S.next;S1.next := S.begin;S.code := gen(S.begin ':') || E.code || gen(E.true ':') || S1.code || gen('goto' S.begin)
goto S.begin
E.true:
E.false: ………..
S.begin
Jumping code/Short Circuit code for boolean expression Boolean Expressions are translated in a sequence of
conditional and unconditional jumps to either E.true or E.false.
a < b. The code is of the form:if a < b then goto E.truegoto E.false
E1 or E2. If E1 is true then E is true, so E1.true = E.true. Otherwise, E2 must be evaluated, so E1.false is set to the label of the first statement in the code for E2.
E1 and E2. Analogous considerations apply. not E1. We just interchange the true and false with that
for E.
Production Semantic Rules
E E1 or E2
E1.true := E.true;
E1.false := newlabel;
E2.true := E.true;
E2.false := E.false;
E.code := E1.code ||
gen(E1.false ':') || E2.code
E E1 and E2
E1.true := newlabel;
E1.false := E.false;
E2.true := E.true;
E2.false := E.false;
E.code := E1.code ||
gen(E1.true ':') || E2.code
Control flow translation of boolean expression
We will now see the code produced for the boolean expression E
Production Semantic Rules
E not E1E1.true := E.false;
E1.false := E.true;
E.code := E1.code
E (E1) E1.true := E.true;
E1.false := E.false;
E.code := E1.code
E id1 relop id2E.code := gen('if' id.place relop.op id2.place 'goto' E.true) || gen('goto' E.false)
E true E.code := gen('goto' E.true)
E false E.code := gen('goto' E.false)
Example
while a < b do if c < d then x := y + z else x := y - z
Example
Lbegin: if a < b goto L1 goto Lnext L1: if c < d goto L2 goto L3 L2: t1 := y + z x := t1 goto Lbegin L3: t2 := y - z x := t2 goto Lbegin Lnext:
while a < b do if c < d then x := y + z else x := y - z
Case Statements
Switch <expression>
begin
case value : statement
case value : statement
……..
case value : statement
default : statement
end
Translation of a case stmt
code to evaluate E into t goto test L1: code for S1 goto next …Ln-1: code for Sn-1 goto next Ln: code for Sn goto next
test: if t = V1 goto L1 … if t = Vn-1 goto Ln-1 goto Lnnext:
Backpatching
Easiest way to implement Syntax directed defn. is to use 2 passes
First, construct syntax tree Walk through syntax tree in depth-first order,
computing translations May not know the labels to which control must flow
at the time a jump is generated Affect boolean expressions and flow control statements Leave targets of jumps temporarily unspecified Add each such statement to a list of goto statements whose
labels will be filled in later This filling in of labels is called back patching
How backpatching is implemented in 1 pass….?
Lists of Labels
Imagine that we are generating quadruples into a quadruple array.
Labels are indices into this array To manipulate this list of labels we use 3 fns.
makelist(i) Creates a new list containing only i, and index into the array of
quadruples Returns a pointer to the new list
merge(p1, p2) Concatenates two lists of labels Returns a pointer to the new list
backpatch(p, i) – inserts i as target label for each statement on the list pointed to by p
Boolean Expressions and Markers
E E1 or M E2
| E1 and M E2
| not E1
| (E1) | id1 relop id2
| true | false
M ε
The New Marker , M
Translation scheme suitable for producing quadruples during bottom-up pass The new marker has an associated semantic action which
Picks up, at appropriate times, the index of the next quadruple to be generated
M.quad := nextquad Nonterminal E will have two new synthesized
attributes: E.truelist contains a list of statements that jump when
expression is true E.falselist contains a list of statements that jump when
expression is false
Example: E E1 and M E2
If E1 is false: Then E is also false So statements on E1.falselist become part of E.falselist
If E1 is true: Still need to test E2
Target for statements on E1.truelist must be the beginning of code generated for E2
Target is obtained using the marker M
New Syntax-Directed Definition (1)
Production Semantic Rules
E E1 or M E2
backpatch(E1.falselist, M.quad);
E.truelist := merge(E1.truelist,
E2.truelist);
E.falselist := E2.falstlist
E E1 and M E2
backpatch(E1.truelist, M.quad);
E.truelist := E2.truelist;
E.falselist := merge(E1.falselist,
E2.falselist)
E not E1
E.truelist := E1.falselist;
E.falselist := E1.truelist
E (E1)E.truelist := E1.truelist;
E.falselist := E1.falselist
New Syntax-Directed Definition (2)
Production Semantic Rules
E id1 relop id2
E.truelist := makelist(nextquad);E.falselist := makelist(nextquad+1);emit('if' id1.place relop.op
id2.place 'goto _');
emit('goto _')
E trueE.truelist := makelist(nextquad);emit('goto _')
E falseE.falselist := makelist(nextquad);emit('goto _')
M ε M.quad := nextquad
Example Revisited (1)
Reconsider: a<b or c<d and e<f First, a<b will be reduced, generating:
100: if a < b goto _101: goto _
Next, the marker M in E E1 or M E2 will be reduced, and M.quad will be set to 102
Next, c<d will be reduced, generating:102: if c < d goto _103: goto _
Example Revisited (2)
Next, the marker M in E E1 and M E2 will be reduced, and M.quad will be set to 104
Next, e<f will be reduced, generating:104: if e < f goto _105: goto _
Next, we reduce by E E1 and M E2
Semantic action calls backpatch({102}, 104) E1.truelist contains only 102 Line 102 now reads: if c <d goto 104
Example Revisited (3)
Next, we reduce by E E1 or M E2 Semantic action calls backpatch({101}, 102) E1.falselist contains only 101 Line 101 now reads: goto 102
Statements generated so far:100: if a < b goto _101: goto 102102: if c < d goto 104103: goto _104: if e < f goto _105: goto _
Remaining goto instructions will have their addresses filled in later
Annotated Parse Tree
Procedure Calls
GrammarS -> call id ( Elist )
Elist -> Elist , E
Elist -> E
Semantic Actions1. S -> call id (Elist) for each item p in queue do
{ gen(‘param’ p) gen(‘call’ id.place)}
2. Elist -> Elist , E {append E.place to the end of queue}
3. Elist -> E { initialize queue to contain only E.place}
e.g.
P (x1,x2,x3,…………….xn)
param x1
param x2
………….………….param xn
call P
Shashwat [email protected]
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