This chapter originally appeared as a part of , Stefan Simkovics' Master's Thesis prepared at Vienna University of Technology under the direction of O.Univ.Prof.Dr. Georg Gottlob and Univ.Ass. Mag. Katrin Seyr. This chapter gives an overview of the internal structure of the backend of Postgres. After having read the following sections you should have an idea of how a query is processed. Don't expect a detailed description here (I think such a description dealing with all data structures and functions used within Postgres would exceed 1000 pages!). This chapter is intended to help understanding the general control and data flow within the backend from receiving a query to sending the results. Here we give a short overview of the stages a query has to pass in order to obtain a result. A connection from an application program to the Postgres server has to be established. The application program transmits a query to the server and receives the results sent back by the server. The parser stage checks the query transmitted by the application program (client) for correct syntax and creates a query tree. The rewrite system takes the query tree created by the parser stage and looks for any rules (stored in the system catalogs) to apply to the querytree and performs the transformations given in the rule bodies. One application of the rewrite system is given in the realization of views. Whenever a query against a view (i.e. a virtual table) is made, the rewrite system rewrites the user's query to a query that accesses the base tables given in the view definition instead. The planner/optimizer takes the (rewritten) querytree and creates a queryplan that will be the input to the executor. It does so by first creating all possible paths leading to the same result. For example if there is an index on a relation to be scanned, there are two paths for the scan. One possibility is a simple sequential scan and the other possibility is to use the index. Next the cost for the execution of each plan is estimated and the cheapest plan is chosen and handed back. The executor recursively steps through the plan tree and retrieves tuples in the way represented by the plan. The executor makes use of the storage system while scanning relations, performs sorts and joins, evaluates qualifications and finally hands back the tuples derived. In the following sections we will cover every of the above listed items in more detail to give a better understanding on Postgres's internal control and data structures. Postgres is implemented using a simple "process per-user" client/server model. In this model there is one client process connected to exactly one server process. As we don't know per se how many connections will be made, we have to use a master process that spawns a new server process every time a connection is requested. This master process is called postmaster and listens at a specified TCP/IP port for incoming connections. Whenever a request for a connection is detected the postmaster process spawns a new server process called postgres. The server tasks (postgres processes) communicate with each other using semaphores and shared memory to ensure data integrity throughout concurrent data access. Figure \ref{connection} illustrates the interaction of the master process postmaster the server process postgres and a client application. The client process can either be the psql frontend (for interactive SQL queries) or any user application implemented using the libpg library. Note that applications implemented using ecpg (the Postgres embedded SQL preprocessor for C) also use this library. Once a connection is established the client process can send a query to the backend (server). The query is transmitted using plain text, i.e. there is no parsing done in the frontend (client). The server parses the query, creates an execution plan, executes the plan and returns the retrieved tuples to the client by transmitting them over the established connection. The parser stage consists of two parts: The parser defined in gram.y and scan.l is built using the Unix tools yacc and lex. The transformation process does modifications and augmentations to the data structures returned by the parser. The parser has to check the query string (which arrives as plain ASCII text) for valid syntax. If the syntax is correct a parse tree is built up and handed back otherwise an error is returned. For the implementation the well known Unix tools lex and yacc are used. The lexer is defined in the file scan.l and is responsible for recognizing identifiers, the SQL keywords etc. For every keyword or identifier that is found, a token is generated and handed to the parser. The parser is defined in the file gram.y and consists of a set of grammar rules and actions that are executed whenever a rule is fired. The code of the actions (which is actually C-code) is used to build up the parse tree. The file scan.l is transformed to the C-source file scan.c using the program lex and gram.y is transformed to gram.c using yacc. After these transformations have taken place a normal C-compiler can be used to create the parser. Never make any changes to the generated C-files as they will be overwritten the next time lex or yacc is called. The mentioned transformations and compilations are normally done automatically using the makefiles shipped with the Postgres source distribution. A detailed description of yacc or the grammar rules given in gram.y would be beyond the scope of this paper. There are many books and documents dealing with lex and yacc. You should be familiar with yacc before you start to study the grammar given in gram.y otherwise you won't understand what happens there. For a better understanding of the data structures used in Postgres for the processing of a query we use an example to illustrate the changes made to these data structures in every stage. This example contains the following simple query that will be used in various descriptions and figures throughout the following sections. The query assumes that the tables given in The Supplier Database have already been defined. select s.sname, se.pno from supplier s, sells se where s.sno > 2 and s.sno = se.sno; Figure \ref{parsetree} shows the parse tree built by the grammar rules and actions given in gram.y for the query given in (without the operator tree for the where clause which is shown in figure \ref{where_clause} because there was not enough space to show both data structures in one figure). The top node of the tree is a SelectStmt node. For every entry appearing in the from clause of the SQL query a RangeVar node is created holding the name of the alias and a pointer to a RelExpr node holding the name of the relation. All RangeVar nodes are collected in a list which is attached to the field fromClause of the SelectStmt node. For every entry appearing in the select list of the SQL query a ResTarget node is created holding a pointer to an Attr node. The Attr node holds the relation name of the entry and a pointer to a Value node holding the name of the attribute. All ResTarget nodes are collected to a list which is connected to the field targetList of the SelectStmt node. Figure \ref{where_clause} shows the operator tree built for the where clause of the SQL query given in which is attached to the field qual of the SelectStmt node. The top node of the operator tree is an A_Expr node representing an AND operation. This node has two successors called lexpr and rexpr pointing to two subtrees. The subtree attached to lexpr represents the qualification s.sno > 2 and the one attached to rexpr represents s.sno = se.sno. For every attribute an Attr node is created holding the name of the relation and a pointer to a Value node holding the name of the attribute. For the constant term appearing in the query a Const node is created holding the value. The transformation process takes the tree handed back by the parser as input and steps recursively through it. If a SelectStmt node is found, it is transformed to a Query node that will be the top most node of the new data structure. Figure \ref{transformed} shows the transformed data structure (the part for the transformed where clause is given in figure \ref{transformed_where} because there was not enough space to show all parts in one figure). Now a check is made, if the relation names in the FROM clause are known to the system. For every relation name that is present in the system catalogs a RTE node is created containing the relation name, the alias name and the relation id. From now on the relation ids are used to refer to the relations given in the query. All RTE nodes are collected in the range table entry list that is connected to the field rtable of the Query node. If a name of a relation that is not known to the system is detected in the query an error will be returned and the query processing will be aborted. Next it is checked if the attribute names used are contained in the relations given in the query. For every attribute} that is found a TLE node is created holding a pointer to a Resdom node (which holds the name of the column) and a pointer to a VAR node. There are two important numbers in the VAR node. The field varno gives the position of the relation containing the current attribute} in the range table entry list created above. The field varattno gives the position of the attribute within the relation. If the name of an attribute cannot be found an error will be returned and the query processing will be aborted. Postgres supports a powerful rule system for the specification of views and ambiguous view updates. Originally the Postgres rule system consisted of two implementations: The first one worked using tuple level processing and was implemented deep in the executor. The rule system was called whenever an individual tuple had been accessed. This implementation was removed in 1995 when the last official release of the Postgres project was transformed into Postgres95. The second implementation of the rule system is a technique called query rewriting. The rewrite system} is a module that exists between the parser stage and the planner/optimizer. This technique is still implemented. For information on the syntax and creation of rules in the Postgres system refer to The PostgreSQL User's Guide. The query rewrite system is a module between the parser stage and the planner/optimizer. It processes the tree handed back by the parser stage (which represents a user query) and if there is a rule present that has to be applied to the query it rewrites the tree to an alternate form. Now we will sketch the algorithm of the query rewrite system. For better illustration we show how to implement views using rules as an example. Let the following rule be given: create rule view_rule as on select to test_view do instead select s.sname, p.pname from supplier s, sells se, part p where s.sno = se.sno and p.pno = se.pno; The given rule will be fired whenever a select against the relation test_view is detected. Instead of selecting the tuples from test_view the select statement given in the action part of the rule is executed. Let the following user-query against test_view be given: select sname from test_view where sname <> 'Smith'; Here is a list of the steps performed by the query rewrite system whenever a user-query against test_view appears. (The following listing is a very informal description of the algorithm just intended for basic understanding. For a detailed description refer to ). Take the query given in the action part of the rule. Adapt the targetlist to meet the number and order of attributes given in the user-query. Add the qualification given in the where clause of the user-query to the qualification of the query given in the action part of the rule. Given the rule definition above, the user-query will be rewritten to the following form (Note that the rewriting is done on the internal representation of the user-query handed back by the parser stage but the derived new data structure will represent the following query): select s.sname from supplier s, sells se, part p where s.sno = se.sno and p.pno = se.pno and s.sname <> 'Smith'; The task of the planner/optimizer is to create an optimal execution plan. It first combines all possible ways of scanning and joining the relations that appear in a query. All the created paths lead to the same result and it's the task of the optimizer to estimate the cost of executing each path and find out which one is the cheapest. The planner/optimizer decides which plans should be generated based upon the types of indexes defined on the relations appearing in a query. There is always the possibility of performing a sequential scan on a relation, so a plan using only sequential scans is always created. Assume an index is defined on a relation (for example a B-tree index) and a query contains the restriction relation.attribute OPR constant. If relation.attribute happens to match the key of the B-tree index and OPR is anything but '<>' another plan is created using the B-tree index to scan the relation. If there are further indexes present and the restrictions in the query happen to match a key of an index further plans will be considered. After all feasible plans have been found for scanning single relations, plans for joining relations are created. The planner/optimizer considers only joins between every two relations for which there exists a corresponding join clause (i.e. for which a restriction like where rel1.attr1=rel2.attr2 exists) in the where qualification. All possible plans are generated for every join pair considered by the planner/optimizer. The three possible join strategies are: nested iteration join: The right relation is scanned once for every tuple found in the left relation. This strategy is easy to implement but can be very time consuming. merge sort join: Each relation is sorted on the join attributes before the join starts. Then the two relations are merged together taking into account that both relations are ordered on the join attributes. This kind of join is more attractive because every relation has to be scanned only once. hash join: the right relation is first hashed on its join attributes. Next the left relation is scanned and the appropriate values of every tuple found are used as hash keys to locate the tuples in the right relation. Here we will give a little description of the nodes appearing in the plan. Figure \ref{plan} shows the plan produced for the query in example \ref{simple_select}. The top node of the plan is a MergeJoin node that has two successors, one attached to the field lefttree and the second attached to the field righttree. Each of the subnodes represents one relation of the join. As mentioned above a merge sort join requires each relation to be sorted. That's why we find a Sort node in each subplan. The additional qualification given in the query (s.sno > 2) is pushed down as far as possible and is attached to the qpqual field of the leaf SeqScan node of the corresponding subplan. The list attached to the field mergeclauses of the MergeJoin node contains information about the join attributes. The values 65000 and 65001 for the varno fields in the VAR nodes appearing in the mergeclauses list (and also in the targetlist) mean that not the tuples of the current node should be considered but the tuples of the next "deeper" nodes (i.e. the top nodes of the subplans) should be used instead. Note that every Sort and SeqScan node appearing in figure \ref{plan} has got a targetlist but because there was not enough space only the one for the MergeJoin node could be drawn. Another task performed by the planner/optimizer is fixing the operator ids in the Expr and Oper nodes. As mentioned earlier, Postgres supports a variety of different data types and even user defined types can be used. To be able to maintain the huge amount of functions and operators it is necessary to store them in a system table. Each function and operator gets a unique operator id. According to the types of the attributes used within the qualifications etc., the appropriate operator ids have to be used. The executor takes the plan handed back by the planner/optimizer and starts processing the top node. In the case of our example (the query given in example \ref{simple_select}) the top node is a MergeJoin node. Before any merge can be done two tuples have to be fetched (one from each subplan). So the executor recursively calls itself to process the subplans (it starts with the subplan attached to lefttree). The new top node (the top node of the left subplan) is a SeqScan node and again a tuple has to be fetched before the node itself can be processed. The executor calls itself recursively another time for the subplan attached to lefttree of the SeqScan node. Now the new top node is a Sort node. As a sort has to be done on the whole relation, the executor starts fetching tuples from the Sort node's subplan and sorts them into a temporary relation (in memory or a file) when the Sort node is visited for the first time. (Further examinations of the Sort node will always return just one tuple from the sorted temporary relation.) Every time the processing of the Sort node needs a new tuple the executor is recursively called for the SeqScan node attached as subplan. The relation (internally referenced by the value given in the scanrelid field) is scanned for the next tuple. If the tuple satisfies the qualification given by the tree attached to qpqual it is handed back, otherwise the next tuple is fetched until the qualification is satisfied. If the last tuple of the relation has been processed a NULL pointer is returned. After a tuple has been handed back by the lefttree of the MergeJoin the righttree is processed in the same way. If both tuples are present the executor processes the MergeJoin node. Whenever a new tuple from one of the subplans is needed a recursive call to the executor is performed to obtain it. If a joined tuple could be created it is handed back and one complete processing of the plan tree has finished. Now the described steps are performed once for every tuple, until a NULL pointer is returned for the processing of the MergeJoin node, indicating that we are finished.