Fallback values in Django

It’s not uncommon to have some type of cascading of values in a system. For instance, in our software, we allow a Brand to have some default settings, and then a Location may override some or all of these settings, or just fallback to the brand settings. I’m going to have a look at how this type of thing can be implemented using Django, and a way that this can be handled seamlessly.

We’ll start with our models:

class Brand(models.Model):
    brand_id = models.AutoField(primary_key=True)
    name = models.TextField()


class Location(models.Model):
    location_id = models.AutoField(primary_key=True)
    brand_id = models.ForeignKey(Brand, related_name='locations')
    name = models.TextField()


WEEKDAYS = [
  (1, _('Monday')),
  (2, _('Tuesday')),
  (3, _('Wednesday')),
  (4, _('Thursday')),
  (5, _('Friday')),
  (6, _('Saturday')),
  (7, _('Sunday')),
]


class BrandSettings(models.Model):
    brand = models.OneToOneField(Brand, primary_key=True, related_name='settings')
    opening_time = models.TimeField()
    closing_time = models.TimeField()
    start_day = models.IntegerField(choices=WEEKDAYS)


class LocationSettings(models.Model):
    location = models.OneToOneField(Location, primary_key=True, related_name='_raw_settings')
    opening_time = models.TimeField(null=True, blank=True)
    closing_time = models.TimeField(null=True, blank=True)
    start_day = models.IntegerField(choices=WEEKDAYS, null=True, blank=True)

We can’t use an abstract base model here, because the LocationSettings values are all optional, but the BrandSettings are not. We might have a look later at a way we can have a base model and inherit-and-change-null on the fields. In the place where we have used this, the relationship between Location and Brand is optional, which complicates things even further.

In practice, we’d have a bunch more settings, but this will make it much easier for us to follow what is going on.

To use these, we want to use a value from the LocationSettings object if it is set, else fall-back to the BrandSettings value for that column.

Location.objects.annotate(
    opening_time=Coalesce('settings__opening_time', 'brand__settings__opening_time'),
    closing_time=Coalesce('settings__closing_time', 'brand__settings__closing_time'),
    start_day=Coalesce('settings__start_day', 'brand__settings__start_day'),
)

And this is fine, but we can make it easier to manage: we want to be able to use Location().settings.start_day, and have that fall-back, but also build some niceness so that we can set values in a nice way in the UI.

We can use a postgres view, and then have a model in front of that:

CREATE OR REPLACE VIEW location_actualsettings AS (
  SELECT location_id,
         COALESCE(location.opening_time, brand.opening_time) AS opening_time,
         COALESCE(location.closing_time, brand.closing_time) AS closing_time,
         COALESCE(location.start_day, brand.start_day) AS start_day
    FROM location_location
   INNER JOIN location_brandsettings brand USING (brand_id)
   INNER JOIN location_locationsettings location USING (location_id)
)

Notice that we have used INNER JOIN for both tables: we are making the assumption that there will always be a settings object for each brand and location.

Now, we want a model in front of this:

class ActualSettings(models.Model):
    location = models.OneToOneField(Location, primary_key=True, related_name='settings')
    opening_time = models.TimeField(null=True, blank=True)
    closing_time = models.TimeField(null=True, blank=True)
    start_day = models.IntegerField(choices=WEEKDAYS, null=True, blank=True)

    class Meta:
        managed = False

We want to indicate that it should allow NULL values in the columns, as when we go to update it, None will be taken to mean “use the brand default”.

As for the ability to write to this model, we have a couple of options. The first is to make sure that when we edit instances of the model, we actually use the Location()._raw_settings instance instead of the Location().settings. The other is to make the ActualSettings view have an update trigger:

CREATE OR REPLACE FUNCTION update_location_settings()
RETURNS TRIGGER AS $$

BEGIN

  IF (TG_OP = 'DELETE') THEN
    RAISE NOTICE 'DELETE FROM location_locationsettings WHERE location_id = %', OLD.location_id;
    DELETE FROM location_locationsettings WHERE location_id = OLD.location_id;
    RETURN OLD;
  ELSIF (TG_OP = 'UPDATE') THEN
    UPDATE location_locationsettings
       SET opening_time = NEW.opening_time,
           closing_time = NEW.closing_time,
           start_day = NEW.start_day
     WHERE location_locationsettings.location_id = NEW.location_id;
    RETURN NEW;
  ELSIF (TG_OP = 'INSERT') THEN
    INSERT INTO location_locationsettings (SELECT NEW.*);
    RETURN NEW;
  END IF;
  RETURN NEW;
END;

$$ LANGUAGE plpgsql VOLATILE;

CREATE TRIGGER update_location_settings
       INSTEAD OF INSERT OR UPDATE OR DELETE
       ON location_actualsettings
       FOR EACH ROW EXECUTE PROCEDURE update_location_settings();

And this works as expected: however it is subject to a pretty significant drawback. If you add columns to the table/view, then you’ll need to update the function. Indeed, if you add columns to the tables, you’ll need to update the view too.

In many cases, this will be sufficient: those tables may not change much, and when they do, it’s just a matter of writing new migrations to update the view and function.


In practice, having the writeable view is probably overkill. You can just use a regular view, with a model in front of it, and then use that model when you need to use the coalesced values, but use the raw model when you are setting values.

You can even make it so that as a UI affordance, you show what the brand fallback value is instead of the None value:

class SettingsForm(forms.ModelForm):
    class Meta:
        model = LocationSettings
        fields = (
            'opening_time',
            'closing_time',
            'start_day'
        )

    def __init__(self, *args, **kwargs):
        super().__init__(*args, **kwargs)
        # We'll probably want to make sure we use a select_related() for this!
        brand = self.instance.location.brand
        brand_settings = brand.settings

        for name, field in self.fields.items():
            # See if the model knows how to display a nice value.
            display = 'get_{}_display'.format(name)
            if hasattr(brand_settings, display):
                brand_value = getattr(brand_settings, display)()
            else:
                brand_value = getattr(brand_settings, name)

            # If we have a time, then we want to format it nicely:
            if isinstance(brand_value, datetime.time):
                brand_value = Template('{{ value|time }}').render(Context({
                  'value': brand_value
                }))

            blank_label = _('Default for {brand}: {value}').format(
                brand=brand.name,
                value=brand_value,
            )

            # If we have a select that is _not_ a multiple select, then we
            # want to make it obvious that the brand default value can be
            # selected, or an explicit choice made.
            if hasattr(field, 'choices') and field.choices[0][0] == '':
                field.widget.choices = field.choices = [
                    (_('Brand default'), [('', blank_label)]),
                    (_('Choices'), list(field.choices[1:]))
                ]
            else:
                # On all other fields, set the placeholder, so that no value
                # entered will show the brand default label.
                field.widget.attrs['placeholder'] = blank_label

As mentioned in a comment: this uses a couple of lookups to get to the BrandSettings, you’d want to make sure your view used a .select_related():

class LocationSettingsView(UpdateView):
    form_class = SettingsForm

    def get_object(self):
        return LocationSettings.objects.select_related('location__brand__settings').get(
            location=self.kwargs['location']
        )

Again, this is all simplified when we have the requirement that there is always a Brand associated with a Location, and each of these always has a related settings object. It’s the latter part of this that is a little tricky. You can have objects automatically created in a signal handler, but in that case it would have to use default values.


Just from a DRY perspective, it would be great if you could have all three models inherit from the one base class, and have the view and trigger function update automatically.

In order to do that, we’ll need to do a bit of magic.

class SettingsBase(models.Model):
    opening_time = models.TimeField()
    closing_time = models.TimeField()
    start_day = models.IntegerField(choices=WEEKDAYS)

    class Meta:
        abstract = True

    def __init_subclass__(cls):
        if getattr(cls, '_settings_optional', False):
            for field in cls._meta.fields:
                field.null = True
                field.blank = True


class BrandSettings(SettingsBase):
    brand = models.OneToOneField(
        Brand,
        primary_key=True,
        related_name='settings',
        on_delete=models.CASCADE,
    )


class LocationSettings(SettingsBase):
    location = models.OneToOneField(
        Location,
        primary_key=True,
        related_name='raw_settings',
        on_delete=models.CASCADE,
    )
    _settings_optional = True


class ActualSettings(SettingsBase):
    location = models.OneToOneField(
        Location,
        primary_key=True,
        related_name='settings',
        on_delete=models.DO_NOTHING,
    )
    _settings_optional

    class Meta:
        managed = False

The magic is all clustered in the one spot, and Django’s order it does things makes this easy. By the time __init_subclass__ is evaluated, the subclass exists, and has all of the inherited fields, but none of the non-inherited fields. So, we can update those fields to not be required, if we find a class attribute _settings_optional that is true.

Automatically creating or replacing the view is a bit more work.

class ActualSettings(BaseSettings):
    location = models.OneToOneField(
        Location,
        primary_key=True,
        related_name='settings',
        on_delete=models.DO_NOTHING,
    )
    _settings_optional = True

    class Meta:
        managed = False

    @classmethod
    def view_queryset(cls):
        settings = {
            attribute: Coalesce(
              'raw_settings__{}'.format(attribute),
              'brand__settings__{}'.format(attribute)
            ) for attribute in (f.name for f in cls._meta.fields)
            if attribute != 'location'
        }
        return Location.objects.annotate(**settings).values('pk', *settings.keys())

This would then need some extra machinery to put that into a migration, and then, when running makemigrations, we’d want to automatically look at the last rendered version of that view, and see if what we have now differs. However, intercepting makemigrations, and changing the operations it creates is something I have not yet figured out how to achieve.

Instead, for Versioning complex database migrations I wound up creating a new management command.

A nicer syntax might be to have some way of defining a postgres view by using a queryset.

ActualSettings = Location.objects.annotate(
    opening_time=Coalesce('_raw_settings__opening_time', 'brand__settings__opening_time'),
    closing_time=Coalesce('_raw_settings__closing_time', 'brand__settings__closing_time'),
    start_day=Coalesce('_raw_settings__start_day', 'brand__settings__start_day'),
).values('location_id', 'opening_time', 'closing_time', 'start_day').as_view()

The problem with this is that we can’t do that in a model definition, as the other models are not loaded at this point in time.

Another possible syntax could be:

class ActualSettings(View):
    location = models.F('location_id')
    opening_time = Coalesce('_raw_settings__opening_time', 'brand__settings__opening_time')
    closing_time = Coalesce('_raw_settings__closing_time', 'brand__settings__closing_time')
    start_day = Coalesce('_raw_settings__start_day', 'brand__settings__start_day')

    class Meta:
      queryset = Location.objects.all()

… but I’m starting to veer off into a different topic now.


Actually writing a trigger function that handles all columns seamlessly is something that we should be able to do. Be warned though, this one is a bit of a doozy:

CREATE OR REPLACE FUNCTION update_instead()
RETURNS TRIGGER AS $$
DECLARE
  primary_key TEXT;
  target_table TEXT;
  columns TEXT;

BEGIN
  -- You must pass as first parameter the name of the table to which writes should
  -- actually be made.
  target_table = TG_ARGV[0]::TEXT;

  -- We want to get the name of the primary key column for the target table,
  -- if that was not already supplied.
  IF (TG_ARGV[1] IS NULL) THEN
    primary_key = (SELECT column_name
                     FROM information_schema.table_constraints
               INNER JOIN information_schema.constraint_column_usage
                    USING (table_catalog, table_schema, table_name,
                           constraint_name, constraint_schema)
                    WHERE constraint_type = 'PRIMARY KEY'
                      AND table_schema = quote_ident(TG_TABLE_SCHEMA)
                      AND table_name = quote_ident(target_table));
  ELSE
    primary_key = TG_ARGV[1]::TEXT;
  END IF;

  -- We also need the names of all of the columns in the current view.
  columns = (SELECT STRING_AGG(quote_ident(column_name), ', ')
               FROM information_schema.columns
              WHERE table_schema = quote_ident(TG_TABLE_SCHEMA)
                AND table_name = quote_ident(TG_TABLE_NAME));

  IF (TG_OP = 'DELETE') THEN
    EXECUTE format(
      'DELETE FROM %1$I WHERE %2$I = ($1).%2$I',
      target_table, primary_key
    ) USING OLD;
    RETURN OLD;
  ELSIF (TG_OP = 'INSERT') THEN
    -- columns must be treated as a string, because we've already
    -- quoted the columns in the query above.
    EXECUTE format(
      'INSERT INTO %1$I (%2$s) (SELECT ($1).*)',
      target_table, columns
    ) USING NEW;
    RETURN NEW;
  ELSIF (TG_OP = 'UPDATE') THEN
    EXECUTE format(
      'UPDATE %1$I SET (%2$s) = (SELECT ($1).*) WHERE %3$I = ($1).%3$I',
      target_table, columns, primary_key
    ) USING NEW;
    RETURN NEW;
  END IF;

  RAISE EXCEPTION 'Unhandled.';
END;

$$ LANGUAGE plpgsql VOLATILE;

There are some things I learned about postgres when doing this: specifically that you can use the EXECUTE format('SELECT ... ($1).%s', arg) USING NEW syntax: the format() function makes it much neater than using string concatenation, and using the EXECUTE '...($1).%s' USING ... form was the only way I was able to access the values from the NEW and OLD aliases within an execute. There’s also a bunch of stuff you have to do to make sure that the columns line up correctly when updating or inserting into the target table.

We can then apply this to our view:

CREATE TRIGGER update_instead
INSTEAD OF UPDATE OR INSERT OR DELETE
ON location_actualsettings
FOR EACH ROW
EXECUTE PROCEDURE update_instead('location_locationsettings', 'location_id');

Opening Hours Redux

A few years ago, I wrote up some stuff about Postgres Composite Types in Django. Holy cow, that appears to be 5 years ago.

Anyway, it’s come up a bit recently on #postgresql on IRC, and I thought I might expand a little on how I’m currently using that concept, and some ideas that could be used to do more.

The composite type itself is quite straightforward: we store two values representing the opening time, and then the length of time that the business is open. This allows us to model things that go over midnight without having to worry about a bunch of checks about (start > finish), and whatever that means.

CREATE TYPE open_period AS (
  start TIME,
  length INTERVAL
);

We could have use a DOMAIN TYPE to limit the length to less than or equal to 24 hours, however I’ll omit that for now.

From there, we can use the new type wherever we would use any other type: including in an array.

CREATE TABLE stores (
  store_id SERIAL PRIMARY KEY,
  name TEXT,
  default_opening_hours open_period[7]
);

Nothing new here since the last post.

However, let’s look at coming up with a mechanism that prevents subsequent days from overlapping with one another. Since we have all of these in an array, we can write a single function that ensures the values are acceptable together. There are a couple of different approaches we could use. One would be to “materialise” the open periods, and then compare them to one another.

CREATE OR REPLACE FUNCTION materialise(open_period, DATE)
RETURNS TSRANGE AS $$

  SELECT TSRANGE(
    ($2 || 'T' || $1.start || 'Z')::TIMESTAMP,
    ($2 || 'T' || $1.start || 'Z')::TIMESTAMP + $1.length
  );

$$ LANGUAGE SQL STRICT IMMUTABLE;



CREATE OR REPLACE FUNCTION materialise(open_period)
RETURNS TSRANGE AS $$

  SELECT materialise($1, '1979-01-01'::DATE);

$$ LANGUAGE SQL STRICT IMMUTABLE;

We have a version there that takes a specific day, but also one that just uses the epoch date. That may be useful later…

…but right now we want to be able to apply subsequent days to each item in the array, and then look for overlaps.

WITH default_opening_hours AS (
  SELECT UNNEST(ARRAY[
    ('09:00', '08:00')::open_period,  -- Monday, but we won't really use that today.
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '12:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('10:00', '07:00')::open_period,
    ('11:00', '06:00')::open_period
  ]) AS hours
), materialised_opening_hours AS (
  SELECT materialise(hours, (now() + INTERVAL '1 day' * row_number() OVER ())::DATE) AS hours
    FROM default_opening_hours
), overlapping_periods AS (
  SELECT hours && LEAD(hours, 1) OVER () AS overlap
    FROM materialised_opening_hours
)
SELECT * FROM overlapping_periods WHERE overlap;

We don’t (at this point in time) really mind if the weekdays that the open periods refer to is the correct weekday: instead we just need to ensure that we have 7 consecutive days, with the sequence of open_periods materialised to the correct value based on the offset from the first day.

This is pretty close: it will find any overlaps between days, except for if the finish of the last day overlaps with the start of the next day. We can cheat a little to make that work:

WITH default_opening_hours AS (
  SELECT UNNEST(ARRAY[
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '12:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('10:00', '07:00')::open_period,
    ('11:00', '06:00')::open_period
  ]) AS hours
), materialised_opening_hours AS (
  SELECT materialise(hours, (now() + INTERVAL '1 day' * row_number() OVER ())::DATE) AS hours
    FROM default_opening_hours

   UNION ALL

  SELECT materialise((SELECT hours FROM default_opening_hours LIMIT 1),
                     (now() + INTERVAL '8 days')::DATE
  )
), overlapping_periods AS (
  SELECT hours && LEAD(hours, 1) OVER () AS overlap
    FROM materialised_opening_hours
)
SELECT * FROM overlapping_periods WHERE overlap;

Let’s put a couple of values in there to see that the overlaps are detected:

WITH default_opening_hours AS (
  SELECT UNNEST(ARRAY[
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '28:00')::open_period,
    ('09:00', '12:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('10:00', '07:00')::open_period,
    ('11:00', '24:00')::open_period
  ]) AS hours
), materialised_opening_hours AS (
  SELECT materialise(hours, (now() + INTERVAL '1 day' * row_number() OVER ())::DATE) AS hours
    FROM default_opening_hours

   UNION ALL

  SELECT materialise((SELECT hours FROM default_opening_hours LIMIT 1),
                     (now() + INTERVAL '8 days')::DATE)
), overlapping_periods AS (
  SELECT hours && LEAD(hours, 1) OVER () AS overlap
    FROM materialised_opening_hours
)
SELECT * FROM overlapping_periods WHERE overlap;
 overlap
─────────
 t
 t
(2 rows)

Now, we can bundle this up into a function that we can then use in a CHECK CONSTRAINT (as we cannot use a subquery directly in a check constraint):

CREATE OR REPLACE FUNCTION find_subsequent_day_overlaps(open_period[])
RETURNS BOOLEAN AS $$
  SELECT NOT EXISTS (
      WITH materialised_opening_hours AS (
        SELECT materialise(hours, (now() + INTERVAL '1 day' * row_number() OVER ())::DATE) AS hours
          FROM unnest($1) hours

         UNION ALL

        SELECT materialise($1[1], (now() + INTERVAL '8 days')::DATE)
      ), overlapping_periods AS (
        SELECT hours && LEAD(hours, 1) OVER () AS overlap FROM materialised_opening_hours
      )
      SELECT * FROM overlapping_periods WHERE overlap
    )
$$ LANGUAGE SQL STRICT IMMUTABLE;
ALTER TABLE store
ADD CONSTRAINT prevent_default_opening_hours_overlap
CHECK (find_subsequent_day_overlaps(default_opening_hours));

And, now to check:

INSERT INTO stores (name, default_opening_hours) VALUES
(
  'John Martins',
  ARRAY[
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('09:00', '12:00')::open_period,
    ('09:00', '08:00')::open_period,
    ('10:00', '07:00')::open_period,
    ('11:00', '06:00')::open_period
  ]
);

And with invalid data:

INSERT INTO stores (name, default_opening_hours) VALUES (
  'Foo',
  ARRAY[('09:00', '08:00')::open_period,
        ('09:00', '08:00')::open_period,
        ('09:00', '08:00')::open_period,
        ('09:00', '12:00')::open_period,
        ('09:00', '08:00')::open_period,
       ('10:00', '07:00')::open_period,
       ('11:00', '24:00')::open_period]);

…which throws an exception:

ERROR:  new row for relation "store" violates check constraint "prevent_default_opening_hours_overlap"
DETAIL:  Failing row contains (2, Foo, {"(09:00:00,08:00:00)","(09:00:00,08:00:00)","(09:00:00,08:00:00...).

Righto, what other things might we want to do with these composite types?

Some businesses have a concept of “Day Parts”, for instance, within a single day we may want to look at a sub-set of that day. For instance, sales during Breakfast may have a different set of Key Performance Indicators than those during Lunch or Tea. So, we may want to store something like:

+------------+------------+-------------+
| Day Period | Start time | Finish time |
+============+============+=============+
| Breakfast  |    06:00   |     10:00   |
| Lunch      |    11:00   |     14:00   |
| Tea        |    16:00   |     21:00   |
+------------+------------+-------------+

Again, it might make sense to store these as an open_period instead, because they could go over midnight. We’ll also want the name to be unique per store, but that’s something we can do with a plain old unique index:

CREATE TABLE day_parts (
  day_part_id SERIAL PRIMARY KEY,
  store_id INTEGER REFERENCES stores(store_id),
  name TEXT,
  period OPEN_PERIOD
);
CREATE UNIQUE INDEX distinct_name_per_day_period ON day_parts (store_id, name)

We can use an exclusion constraint to prevent overlaps, however you may need to enable support first:

CREATE EXTENSION btree_gist;

Now, let’s see the exclusion constraint:

ALTER TABLE day_parts
ADD CONSTRAINT prevent_overlapping_day_parts
EXCLUDE USING gist(
  materialise(period) WITH &&,
  store_id WITH =
);

Turns out that is actually easier to implement than the values in the array!


The other thing we may want to do is annotate on the Day Period to an object of some sort. To do this we will need to materialise all of the day periods for the given day(s), and see which one of them our timestamp is within. We will expand on a couple of things here: specifically, we need to have a timezone within which our store is located. To make things easier to follow, we will have all of the DDL code anew. This is partly because this example will not use the concept of default opening hours.

CREATE TABLE stores (
  store_id SERIAL PRIMARY KEY,
  name TEXT UNIQUE NOT NULL,
  timezone TEXT NOT NULL CHECK (now() AT TIME ZONE timezone IS NOT NULL)
  -- Note we validate that this column contains a valid timezone by
  -- attempting to coerce now() to that timezone: this will report
  -- back an error if the timezone name is not recognised.
);

CREATE TABLE day_parts (
  day_part_id SERIAL PRIMARY KEY,
  store_id INTEGER REFERENCES stores (store_id),
  name TEXT,
  period OPEN_PERIOD,
  CONSTRAINT prevent_overlapping_day_parts EXCLUDE USING gist(
    materialise(period) WITH &&,
    store_id WITH =
  )
);

CREATE UNIQUE INDEX distinct_name_per_day_period ON day_parts(store_id, name);

CREATE TABLE transactions (
  transaction_id SERIAL PRIMARY KEY,
  store_id INTEGER REFERENCES stores (store_id),
  timestamp TIMESTAMPTZ,
  amount NUMERIC
);

And now add some data:

INSERT INTO stores (name, timezone)
     VALUES ('John Martins', 'Australia/Adelaide');

INSERT INTO day_parts (store_id, name, period)
     VALUES (1, 'Morning',   ('09:00', '02:00')),
            (1, 'Lunch',     ('11:00', '03:00')),
            (1, 'Afternoon', ('14:00', '03:00')),
            (1, 'Evening',   ('17:00', '04:00'));


INSERT INTO transactions (store_id, timestamp, amount)
     VALUES (1, '2019-05-27T01:25:22', '33.77'),
            (1, '2019-05-27T04:33:47', '724.75'),
            (1, '2019-05-27T06:00:42', '47.48'),
            (1, '2019-05-27T08:33:12', '3.44');

The first thing we want to do is show the transactions at the time it was in the store when they were completed:

SELECT transactions.*,
       transactions.timestamp AT TIME ZONE stores.timezone AS local_time
  FROM transactions
 INNER JOIN stores USING (store_id)
 transaction_id │ store_id │       timestamp        │ amount │     local_time
              1 │        1 │ 2019-05-27 01:25:22+00 │  33.77 │ 2019-05-27 10:55:22
              2 │        1 │ 2019-05-27 04:33:47+00 │ 724.75 │ 2019-05-27 14:03:47
              3 │        1 │ 2019-05-27 06:00:42+00 │  47.48 │ 2019-05-27 15:30:42
              4 │        1 │ 2019-05-27 08:33:12+00 │   3.44 │ 2019-05-27 18:03:12

Next, we want to annotate on which day part corresponds to that local time:

SELECT trans.*,
       day_part.name AS day_part
  FROM (
    SELECT transactions.*,
           transactions.timestamp AT TIME ZONE stores.timezone AS local_time
      FROM transactions
     INNER JOIN stores USING (store_id)
  ) trans
  LEFT OUTER JOIN LATERAL (
    SELECT materialise(day_parts.period, trans.local_time::DATE) AS day_part,
           day_parts.name
      FROM day_parts
     WHERE day_parts.store_id = trans.store_id
  ) day_part ON (day_part @> local_time)
 transaction_id │ store_id │       timestamp        │ amount │     local_time      │ day_part
────────────────┼──────────┼────────────────────────┼────────┼─────────────────────┼───────────
              1 │        1 │ 2019-05-27 01:25:22+00 │  33.77 │ 2019-05-27 10:55:22 │ Morning
              2 │        1 │ 2019-05-27 04:33:47+00 │ 724.75 │ 2019-05-27 14:03:47 │ Afternoon
              3 │        1 │ 2019-05-27 06:00:42+00 │  47.48 │ 2019-05-27 15:30:42 │ Afternoon
              4 │        1 │ 2019-05-27 08:33:12+00 │   3.44 │ 2019-05-27 18:03:12 │ Evening

From there, we could look at aggregation within day parts, or comparisons between different days, but only the same day part.


Those of you paying attention may notice that I used TSRANGE instead of TSTZRANGE in the materialise functions. Can we look at a version of these functions that accepts a timezone as well as a date (and open_period), and gives back a TSTZRANGE?

CREATE OR REPLACE FUNCTION materialise(open_period, DATE, timezone TEXT)
RETURNS TSTZRANGE AS $$

  SELECT TSTZRANGE(
    ($2 || 'T' || $1.start)::TIMESTAMP AT TIME ZONE timezone,
    (($2 || 'T' || $1.start)::TIMESTAMP + $1.length) AT TIME ZONE timezone
  );

$$ LANGUAGE SQL STRICT IMMUTABLE;

Now we can rewrite our last query:

SELECT transactions.*,
       day_part.name AS day_part
  FROM transactions
  LEFT OUTER JOIN LATERAL (
    SELECT materialise(day_parts.period, transactions.timestamp::DATE, stores.timezone) AS day_part,
           day_parts.name
      FROM day_parts
      INNER JOIN stores USING (store_id)
     WHERE day_parts.store_id = transactions.store_id
  ) day_part ON (day_part.day_part @> transactions.timestamp)
 transaction_id │ store_id │       timestamp        │ amount │ day_part
              1 │        1 │ 2019-05-27 01:25:22+00 │  33.77 │ Morning
              2 │        1 │ 2019-05-27 04:33:47+00 │ 724.75 │ Afternoon
              3 │        1 │ 2019-05-27 06:00:42+00 │  47.48 │ Afternoon
              4 │        1 │ 2019-05-27 08:33:12+00 │   3.44 │ Evening

Although, I think this might be a bit harder to do aggregation per-day, because you’d still need to get the “local” timestamp to put them on the same day, although, that’s actually part of the materialisation of the store’s full open period anyway.

Postgres Generated Columns

A little while ago, I wrote about creating a nice way to have a Django ComputedField. It is pretty neat, except it needs to do some black magic to sniff up the stack to work around a limitation in the way a Ref/Col works in Django.

The way it works is that you define the expression in Python, and it evaluates it in the database, allowing you to query based on this, and have it automatically annotated on.

What it doesn’t do, however, is actually store that value in the database. Indeed, if you are actually querying on this column, you’d probably want to have a functional index that uses the same expression, so that the database can do a reasonable job of improving query times on that column.

New in Postgres 12 is a feature that really piqued my interest: Generated Columns.

These are basically what the ComputedField does, but at the database level. And, instead of it being an expression that is evaluated at query time, it is instead an expression that is evaluated at write time, and stored in an actual column (that could then have an index applied to it).

Let’s have a look at an example:

CREATE TABLE person (
  person_id integer PRIMARY KEY GENERATED BY DEFAULT AS IDENTITY,
  first_name TEXT,
  last_name TEXT,
  full_name TEXT GENERATED ALWAYS AS (
    COALESCE(first_name, '') || ' ' || COALESCE(last_name, '')
  ) STORED
);

Again, I’m aware I’m failing to note at least one of the falsehoods programmers believe about names.

Notes about this:

  • I’ve used the similar (preferred) syntax for generating the primary key.
  • You must have the keyword STORED at the end of the column definition: or more specifically, the syntax must be <column> <type> GENERATED ALWAYS AS (<expression>) STORED.
  • You may only refer to other columns within the same row: similar to how a functional index would work.
  • You may not refer to other generated columns: that would likely require parsing the expressions to determine which one to calculate first. I’d love to see postgres implement that at some point though!

So, let’s have a look at that with some data:

INSERT INTO person (first_name, last_name)
VALUES
    ('alice', 'aardvark'),
    ('bob', 'burger'),
    ('chuck', NULL),
    (NULL, 'darris');

And when we query it:

SELECT * FROM person;
 person_id │ first_name │ last_name │   full_name
 ------------------------------------------------------
         1 │ alice      │ aardvark  │ alice aardvark
         2 │ bob        │ burger    │ bob burger
         3 │ chuck      │ <NULL>    │ chuck
         4 │ <NULL>     │ darris    │  darris
(4 rows)

Oh, bother. We didn’t want the space before ‘darris’ (or the one you can’t see, after ‘chuck’). We’ll have to fix that in a sec.

So, what happens when we try to write to the full_name column?

UPDATE person SET first_name = 'dave', full_name='foo' WHERE first_name IS NULL;
ERROR:  column "full_name" can only be updated to DEFAULT
DETAIL:  Column "full_name" is a generated column.

Okay, that’s nice to know. If the error was ignored, we could have just used a custom django field and ignored the value, but we’ll need something similar to how ComputedField prevents writing values. I’ll have to investigate that further.

But, back onto the fact I forgot to trim any leading or trailing spaces. It turns out that there is no way to alter the expression that is being used in a generated column. Which, when you think a little more about it, sort-of makes sense. At the very least, it would need to write new values to each column where the new value was different to the old value.

Instead, you need to drop the column, and re-add it with the correct expression. You’ll almost certainly want to do this in a transaction:

BEGIN;
ALTER TABLE person DROP COLUMN full_name;
ALTER TABLE person ADD COLUMN full_name TEXT
      GENERATED ALWAYS AS (TRIM(
        COALESCE(first_name, '') || ' ' ||
        COALESCE(last_name, '')
      )) STORED;
COMMIT;

And now we can query our table again:

SELECT * FROM person;
 person_id │ first_name │ last_name │   full_name
 ------------------------------------------------------
         1 │ alice      │ aardvark  │ alice aardvark
         2 │ bob        │ burger    │ bob burger
         3 │ chuck      │ <NULL>    │ chuck
         4 │ <NULL>     │ darris    │ darris
(4 rows)

Sweet.

Django ComputedField()

A very common pattern, at least in code that I’ve written (and read) is to annotate on a field that uses an expression that is based on one or more other fields. This could then be used to filter the objects, or just in some other way.

The usual method of doing this is:

from django.db import models
from django.db.models.expressions import F, Value
from django.db.models.function import Concat


class PersonQuerySet(models.query.QuerySet):
    def with_name(self):
        return self.annotate(
            name=Concat(F('first_name'), Value(' '), F('last_name'), output_field=models.TextField()),
        )


class Person(models.Model):
    first_name = models.TextField()
    last_name = models.TextField()

    objects = PersonQuerySet.as_manager()

Yes, I’m aware of falsehoods programmers believe about names, but this is an easy-to-follow example.

In order to be able to access the name field, we must use the with_name() queryset method. This is usually okay, but if it is something that we almost always want, it can be a little tiresome. Alternatively, you could override the get_queryset() method of a custom manager, but that makes it somewhat surprising to a reader of the code. There are also some places where a custom manager will not automatically be used, or where it will be cumbersome to include the fields from a custom manager (select_related, for instance).

It would be much nicer if we could write the field declaratively, and have it use the normal django mechanism of defer and only to remove it from the query if required.

class Person(models.Model):
    first_name = models.TextField()
    last_name = models.TextField()
    name = ComputedField(Concat(F('first_name'), Value(' '), F('last_name'), output_field=models.TextField()))

I’ve spent some time digging around in the django source code, and have a fairly reasonable understanding of how fields work, and how queries are built up. But I did wonder how close to a working proof of concept of this type of field we could get without having to change any of the django source code. After all, I was able to backport the entire Subquery expression stuff to older versions of django after writing that. It would be nice to repeat the process here.

There are a few things you need to do to get this to work:

  • store the expression
  • prevent the field from creating a migration
  • ensure the field knows how to interpret data from the database
  • ensure the field adds the expression to it’s serialised version
  • prevent the field from writing data back to the database
  • inject the expression into the query instead of the field name
class ComputedField(models.Field):
    def __init__(self, expression, *args, **kwargs):
        self.expression = expression.copy()
        kwargs.update(editable=False)
        super().__init__(*args, **kwargs)

There is already a mechanism for a field to prevent a migration operation from being generated: it can return a db_type of None.

    def db_type(self, connection):
        return None

We can delegate the responsibility of interpreting the data from the database to the output field of the expression - that’s how it works in the normal operation of expressions.

    def from_db_value(self, value, expression, connection):
        return self.expression.output_field.from_db_value(value, expression, connection)

Storing the expression in the serialised version of a field is explained in the documentation on custom fields:

    def deconstruct(self):
        name, path, args, kwargs = super().deconstruct()
        return name, path, [self.expression] + args, kwargs

To prevent the field from being included in the data we write back to the database turned out to be fairly tricky. There are a couple of mechanisms that can be used, but ultimately the only one that worked in the way I needed was something that is used by the inheritance mechanism. We have to indicate that it is a “private” field. I’m not 100% sure of what the other implications of this might be, but the outcome of making this field private is that it no longer appears in the list of local fields. There is one drawback to this, which I’ll discuss below.

    def contribute_to_class(self, cls, name, private_only=False):
        return super().contribute_to_class(cls, name, True)

So, we only have one task to complete. How do we inject the expression into the query instead of the column?

When django evaluates a queryset, it look at the annotations, and the expressions that are in these. It will then “resolve” these expressions (which means the expression gets told which “query” is being used to evaluate it, allowing it to do whatever it needs to do to make things work).

When a regular field is encountered, it is not resolved: instead it is turned into a Col. This happens in a few different places, but the problem is that a Col should not need to know which query it belongs to: at most it needs to know what the aliased table name is. So, we don’t have a query object we can pass to the resolve_expression method of our expression.

Instead, we’ll need to use Python’s introspection to look up the stack until we find a place that has a reference to this query.

    def get_col(self, alias, output_field=None):
        import inspect

        query = None

        for frame in inspect.stack():
            if frame.function in ['get_default_columns', 'get_order_by']:
                query = frame.frame.f_locals['self'].query
                break
            if frame.function in ['add_fields', 'build_filter']:
                query = frame.frame.f_locals['self']
                break
        else:
            # Aaargh! We don't handle this one yet!
            import pdb; pdb.set_trace()

        col = self.expression.resolve_expression(query=query)
        col.target = self
        return col

So, how does this code actually work? We go through each frame in the stack, and look for a function (or method, but they are really just functions in python) that matches one of the types we know about that have a reference to the query. Then, we grab that, stop iterating and resolve our expression. We have to set the “target” of our resolved expression to the original field, which is how the Col interface works.

This moves the resolve_expression into the get_col, which is where it needs to be. The (resolved) expression is used as the faked column, and it knows how to generate it’s own SQL, which will be put into the query in the correct location.

And this works, almost.

There is one more situation that needs to be taken into account: when we are referencing the field through a join (the x__y lookup syntax you often see in django filters).

Because F() expressions reference the local query, we need to first turn any of these that we find in our computed field’s expression (at any level) into a Col that refers to the correct model. We need to do this before the resolve_expression takes place.

    def get_col(self, alias, output_field=None):
        query = None

        for frame in inspect.stack():
            if frame.function in ['get_default_columns', 'get_order_by']:
                query = frame.frame.f_locals['self'].query
                break
            if frame.function in ['add_fields', 'build_filter']:
                query = frame.frame.f_locals['self']
                break
        else:
            # Aaargh! We don't handle this one yet!
            import pdb; pdb.set_trace()

        def resolve_f(expression):
            if hasattr(expression, 'get_source_expressions'):
                expression = expression.copy()
                expression.set_source_expressions([
                  resolve_f(expr) for expr in expression.get_source_expressions()
                ])
            if isinstance(expression, models.F):
                field = self.model._meta.get_field(expression.name)
                if hasattr(field, 'expression'):
                    return resolve_f(field.expression)
                return Col(alias, field)
            return expression

        col = resolve_f(self.expression).resolve_expression(query=query)
        col.target = self
        return col

There is a repo containing this, which has a bunch of tests showing how the different query types can use the computed field:

https://github.com/schinckel/django-computed-field


But wait, there is one more thing…

A very common requirement, especially if you are planning on using this column for filtering, would be to stick an index on there.

Unfortunately, that’s not currently possible: the mechanism for preventing the field name from being in the write queries, making it a private field, prevents using this field in an index. Anyway, function/expression indexes are not currently supported in Django.

It’s not all bad news though: Markus has a Pull Request that will enable this feauture; from there we could (if db_index is set) automatically add an expression index to Model._meta.indexes in contribute_to_class, but it would also be great to be able to use index_together.

I suspect to get that, though, we’ll need another mechansim to prevent it being in the write queries, but still be a local field.

(Thanks to FunkyBob for suggestions, including suggesting the field at all).

On Fences and Functions

I grew up on a farm.

We had fences on the farm.

Whilst the jobs associated with fences and fencing are less than fun, the fences themselves are extremely important. They keep the livestock in the correct location. When you have a damaged or incomplete fence, even if it is only damaged in a small way, it can cost significant amounts of money, even human lives. This can vary between keeping Rams from a flock of Ewes that you don’t want them to mate with (because you need to know which Ram mated with which Ewes in order to track progeny), to livestock escaping onto a public road and causing accidents.

Fences are a good thing.


My first career was as a Design and Technology Teacher.

We use fences in woodwork. They are attachments to fixed power tools, such as drill presses and circular saws. They allow us to work safely and to get accurate, easily repeatable results. For instance. we can use a fence to cut sheets of MDF to exactly the same width, ensuring the bookcase we are making is square. Without a fence, it can still be done, but it will certainly be much harder.

Fences are a good thing.


I’d heard people describe Postgres’s CTEs (Common Table Expressions) as an “optimisation fence”. Given my previous uses of the word “fence”, I assumed that this was widely regarded as a good thing.

However, after spending some time writing really complex queries (that are most easily described using a CTE), I happened to read PostgreSQL’s CTEs are optimisation fences. It had (throughout my work within Postgres) become plain to me that each term in a CTE is materialised (if it is referenced at all), before any filtering that might occur later would allow it to be filtered earlier. Postgres is pretty good about pushing these changes down into a sub-query, but it can mean that a CTE performs worse, as it might have to do more work. However, this article points this out in some detail, and it occurred to me that perhaps some people see fences (in general) as an obstacle. Perhaps fencing something in has negative connotations?

I’m not sure that that’s exactly what the author meant (I wonder if it was sarcasm, perhaps), but it did get me thinking about how different backgrounds could result in opposite interpretations of the same terms.


I do want to veer back a bit into a technical manner, and discuss how I have been overcoming the fact that it’s not possible to push the filtering back up the stack in a CTE.

Largely, the issue exists in my code because I have lots of complex queries (as I just mentioned) that are far easier to write, reason about and debug when written using a CTE. I would like to write them as a VIEW, and then stick Django models in front of them, and I’d be able to query them using the ORM, and just have the view as the db_table of the model. It would be really nice.

But this doesn’t work, because some of the queries require aggregating data across models of which there are millions of rows, and some of the database tables are less than optimal. For instance, I have several tables that store an effective_from field, and in the case of superseding, the same set of other fields (person, for instance) means we can know which one applies on a given date. However, to query this, we end up writing a more complex query (instead of being able to do a date <@ daterange query, if the valid period was stored in the table). I’ve learned from this in newer models, but some stuff is too deeply ingrained to be able to be changed just yet.

So, I have a VIEW that turns this into a data that actually contains dateranges, and I can query against that. But, if I use this in a CTE, then it can materialise the whole lot, which can be slow. So, I needed to come up with a way to filter the data earlier.

Functions.

I’ve been writing SQL functions that take parameters, and then filter as early as possible. This then means that it’s a real possibility that we can get <100ms queries for stuff that is really, really complicated (and joins a couple of dozen or more tables in really funky ways). It does mean I can’t query using the Django ORM, but that’s okay: the data I’m getting back doesn’t necessarily map onto a model anyway, and we need to use it as a dict.

More recently, I’ve extended this so that the function (with the relevant parameters, extracted out of the queryset WHERE clauses) can be used as the db_table for a Model. It’s still somewhat hacky, but is very interesting, nonetheless.

Postgres Tree Shootout part 3: Adjacency List using Views

It’s been a while, but I’ve finally gotten off my arsefound some time to revisit this series. As promised last time, I’m going to rewrite the queries from the Adjacency List “solutions” using a View. Indeed, there will be two versions of the view - one which is a MATERIALIZED VIEW. There will also be discussion of when the two different types of view might be best to use.

One of the reasons this post took so long to write was that I was sidetracked by writing an SVG generator that would allow for graphically seeing what the different operations discussed in this series look like in terms of an actual tree. That didn’t eventuate.

We will start by defining what our tree view will actually look like. You’ll notice is it rather like the CTE that we saw in the previous post.

CREATE TABLE nodes (
  node_id SERIAL PRIMARY KEY,
  parent_id INTEGER REFERENCES nodes(node_id)
);

CREATE RECURSIVE VIEW tree (node_id, ancestors) AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
);

INSERT INTO nodes VALUES
  (1, NULL),
  (2, 1),
  (3, 1),
  (4, 2),
  (5, 2),
  (6, 3),
  (7, 3),
  (8, 4),
  (9, 8),
  (10, NULL),
  (11, 10),
  (12, 11),
  (13, 11),
  (14, 12),
  (15, 12),
  (16, 12);

Insertions

All of the insertions do not require access to the tree view, since the beauty of an Adjacency List model is that you only ever need to operate on the immediate parent-child.

Removals

Similarly, we will skip over the simple operations: those don’t require access to any more of the tree than just the parent-child relationship. It’s not until we need to remove a subtree that it becomes interesting.

DELETE FROM nodes
WHERE node_id IN (
  SELECT node_id FROM tree WHERE 2 = ANY(ancestors)
) OR node_id = 2;

If you are paying attention, you will notice that this is virtually identical to the CTE version, except that we no longer need to redeclare the CTE each time. The full tree deletion is the same, as is removing all decscendants:

DELETE FROM nodes
WHERE node_id IN (
  SELECT node_id FROM tree WHERE 2 = ANY(ancestors)
);

Moves

Again, the operations that don’t require the actual tree are unchanged: this is where the Adjacency List really shines.

Fetches

Since we are starting with the “full” tree, we should be able to use it for all of the queries. It is possible that these queries (unlike those we have seen before) may be slightly slower than the CTE version (specifically, those where the CTE is customised for that operation).

Descendants

Let’s get all of node 10’s descendants:

SELECT node_id FROM tree WHERE 10 = ANY(ancestors);

This query is far less complicated than the CTE version, as expected. However, when dealing with very large datasets, it performs far worse. I have a data set with 221000 nodes, in 1001 different trees. Performing this query takes around 5 seconds, but the customised CTE version takes about 750ms.

Turning this view into a materialised view:

CREATE MATERIALIZED VIEW tree_mat AS
SELECT node_id, ancestors FROM tree;

and then querying that turns this into around 75ms.

To limit the query to nodes to a given depth requires slightly more work.

SELECT node_id, ancestors FROM tree
WHERE ARRAY_POSITION(ancestors, 10) < ARRAY_LENGTH(ancestors, 1) - 2;

Ancestors

Fetching ancestors of a node is again trivial:

SELECT unnest(ancestors) FROM tree WHERE node_id = 15;

And the count of ancestors:

SELECT ARRAY_LENGTH(ancestors, 1) FROM tree WHERE node_id=15;

Getting a set of ancestors to a given depth is actually a little tricky: because we can’t just reverse the end that we add the parent node to the ancestors array, we can’t use that trick. We’ll have to enumerate the rows, and then extract those we care about. You can’t use OFFSET with a variable, otherwise that would be a nice trick.

WITH ancestors AS (
  SELECT unnest(ancestors) AS node_id
  FROM tree
  WHERE node_id = 15
), enumerated AS (
  SELECT
    row_number() OVER () AS row,
    count(*) OVER () AS ancestor_count,
    node_id
  FROM ancestors
)
SELECT node_id
FROM enumerated
WHERE "row" > ancestor_count - 2;

Ugh. That’s way worse than the CTE version.

Special queries

None of the special queries access the tree in any way, so can be omitted for now.

Discussion

So how does using a view stack up to the ad-hoc CTE queries?

Mostly pretty well. In the case where you have only small data sets, then the view that builds up the complete tree each time is not that much of a problem (I ran some tests with tens of thousands of items, and it still performed relatively well). When it moves up to hundreds of thousands, then the ad-hoc CTE versions can greatly outperform the full tree view.

However, using a materialised view changes everything. It now becomes just as fast as querying a table: indeed, that’s just what it is. You could have triggers based on changes to the nodes table causing a REFRESH MATERIALIZED VIEW, but it is worth keeping in mind that this will take some time: in my case, a full refresh of 221000 rows took upwards of 4.5 seconds.

Using a materialised view gets us most of the way to (and leads nicely into the next method), storing a materialised path. The similarity of the names here should be a trigger, but now I’m just making foreshadowing jokes.

slugify() for postgres (almost)

A recent discussion in #django suggested “what we need is a PG slugify function”.

The actual algorithm in Django for this is fairly simple, and easy to follow. Shouldn’t be too hard to write it in SQL.

Function slugify(value, allow_unicode=False).

  • Convert to ASCII if allow_unicode is false
  • Remove characters that aren’t alphanum, underscores, hyphens
  • Strip leading/trailing whitespace
  • Convert to lowercase
  • Convert spaces to hyphens
  • Remove repeated hyphens

(As an aside, the comment in the django function is slightly misleading: if you followed the algorithm there, you’d get a different result with respect to leading trailing whitespace. I shall submit a PR).

We can write an SQL function that uses the Postgres unaccent extension to get pretty close:

CREATE OR REPLACE FUNCTION slugify("value" TEXT, "allow_unicode" BOOLEAN)
RETURNS TEXT AS $$

  WITH "normalized" AS (
    SELECT CASE
      WHEN "allow_unicode" THEN "value"
      ELSE unaccent("value")
    END AS "value"
  ),
  "remove_chars" AS (
    SELECT regexp_replace("value", E'[^\\w\\s-]', '', 'gi') AS "value"
    FROM "normalized"
  ),
  "lowercase" AS (
    SELECT lower("value") AS "value"
    FROM "remove_chars"
  ),
  "trimmed" AS (
    SELECT trim("value") AS "value"
    FROM "lowercase"
  ),
  "hyphenated" AS (
    SELECT regexp_replace("value", E'[-\\s]+', '-', 'gi') AS "value"
    FROM "trimmed"
  )
  SELECT "value" FROM "hyphenated";

$$ LANGUAGE SQL STRICT IMMUTABLE;

I’ve used a CTE to get each step as a seperate query: you can do it with just two levels if you don’t mind looking at nested function calls:

CREATE OR REPLACE FUNCTION slugify("value" TEXT, "allow_unicode" BOOLEAN)
RETURNS TEXT AS $$

  WITH "normalized" AS (
    SELECT CASE
      WHEN "allow_unicode" THEN "value"
      ELSE unaccent("value")
    END AS "value"
  )
  SELECT regexp_replace(
    trim(
      lower(
        regexp_replace(
          "value",
          E'[^\\w\\s-]',
          '',
          'gi'
        )
      )
    ),
    E'[-\\s]+', '-', 'gi'
  ) FROM "normalized";

$$ LANGUAGE SQL STRICT IMMUTABLE;

To get the default value for the second argument, we can have an overloaded version with only a single argument:

CREATE OR REPLACE FUNCTION slugify(TEXT)
RETURNS TEXT AS 'SELECT slugify($1, false)' LANGUAGE SQL IMMUTABLE STRICT;

Now for some tests. I’ve been using pgTAP lately, so here’s some tests using that:

BEGIN;

SELECT plan(7);

SELECT is(slugify('Hello, World!', false), 'hello-world');
SELECT is(slugify('Héllø, Wørld!', false), 'hello-world');
SELECT is(slugify('spam & eggs', false), 'spam-eggs');
SELECT is(slugify('spam & ıçüş', true), 'spam-ıçüş');
SELECT is(slugify('foo ıç bar', true), 'foo-ıç-bar');
SELECT is(slugify('    foo ıç bar', true), 'foo-ıç-bar');
SELECT is(slugify('你好', true), '你好');

SELECT * FROM finish();

ROLLBACK;

And we get one failing test:

=# SELECT is(slugify('你好', true), '你好');

          is
──────────────────────
 not ok 7            ↵
 # Failed test 7     ↵
 #         have:     ↵
 #         want: 你好
(1 row)

Time: 2.004 ms

It seems there is no way to get the equivalent to the python re.U flag on a postgres regular expression function, so that is as close as we can get.

Bowled over by Postgres

There’s a nice article at Bowled Over by SQL Window Functions by a chap called Dwain Camps. It’s written from the perspective of T-SQL, which has some differences to Postgres’s DDL and querying. I’ve reworked his stuff into what feels nice for me from a Postgressy perspective.

I’ll recap a couple of things he mentions, but you’ll probably want to head there and read that first.

  • Strike: all pins knocked down on the first ball of a frame. Scores 10 (from this frame), plus the total of whatever the next two balls knock down.
  • Spare: all pins knocked down on the second ball of a frame. Scores 10 (from this frame), plus how ever many pins you knock down on the next ball.
  • Open: at least one pin remains standing at the end of the frame. Score is how ever many pins you knocked down.

By convention, only the running tally is shown on the scoresheet. I’ve kept the frame score as the score for this frame only, and the total will contain the running total.


The first thing I do a bit differently is to use Postgres’ DOMAIN structures, which enables us to remove some of the check constraints, and simplify some others:

CREATE SCHEMA bowling;

CREATE DOMAIN bowling.frame_number AS integer
  CHECK ('[1,10]'::int4range @> VALUE)
  NOT NULL;

CREATE DOMAIN bowling.ball AS integer
  CHECK ('[0,10]'::int4range @> VALUE);

So, now we have two integer domains: the frame number may be between 1 and 10, and the ball pin count may be null, or between 0 and 10.

We’ll start by recreating the table structure: initially without constraints:

CREATE TABLE bowling.frame
(
  game_id INTEGER NOT NULL,
  player_id INTEGER NOT NULL,
  frame bowling.frame_number NOT NULL,
  ball1 bowling.ball NOT NULL,
  ball2 bowling.ball NULL,
  ball3 bowling.ball NULL,
  PRIMARY KEY (game_id, player_id, frame)
);

Not much different to the original, other than using those fresh new domain types.

The other approach I’ve used is to use more constraints, but make them simpler. I’m also relying on the fact that X + NULL => NULL, which means we can leave off a heap of the constraint clauses.

We’ll start by preventing the (non-final) frames from exceeding the number of available pins. In the case of final frame, we still only allow a spare unless we have a strike already.

ALTER TABLE bowling.frame
ADD CONSTRAINT max_spare_unless_frame_10_strike CHECK
(
  ball1 + ball2 <= 10 OR (frame = 10 AND ball1 = 10)
);

This is as simple as it can be. Because ball 2 may be null but ball 1 may not, and each ball must be no greater than 10, this is enough to encapsulate the requirement. There is one slightly incorrect circumstance: a value of (10, 0) would be valid, which is strictly incorrect (ball 2 was never bowled). In the case of the calculations it’s all correct, but if a 0 was bowled immediately after a strike, it may be possible to insert that as ball 2, which would be misleading.

ALTER TABLE bowling.frame
ADD CONSTRAINT ball_2_never_bowled_after_strike CHECK
(
  ball2 IS NULL OR ball1 < 10 OR frame = 10
);

We can now prevent ball 3 from being set unless we are on frame 10.

ALTER TABLE bowling.frame
ADD CONSTRAINT ball_3_only_in_frame_10 CHECK
(
  ball3 IS NULL OR frame = 10
);

A follow-up to the previous constraint: we only get to bowl ball 3 if we have bowled ball 2, and scored a strike or spare already. Note, we may have a strike on the first ball, which means we might have more than 10.

ALTER TABLE bowling.frame
ADD CONSTRAINT ball3_only_if_eligible CHECK
(
  ball3 IS NULL OR (ball2 IS NOT NULL AND ball1 + ball2 >= 10)
);

Finally, we have some specific allowable conditions for that last ball. We already know that we must have scored a strike or spare with the first two balls, but we need to know how many pins are available to us.

If we scored a spare or two strikes, then we may have any number up to 10 to score now. Otherwise, we have however many pins were left by ball 2 (which means ball 1 must have been a strike).

ALTER TABLE bowling.frame
ADD CONSTRAINT ball3_max_spare_or_strike CHECK
(
  ball2 + ball3 <= 10
  OR
  ball1 + ball2 = 20
  OR
  ball1 + ball2 = 10
);

I find those constraints much easier to read that the original ones.


I’ve written a view, that uses a couple of Common Table Expressions (CTEs), as well as the window functions Dwain discussed.

CREATE OR REPLACE VIEW bowling.frame_score AS (
  WITH pin_counts AS (
    SELECT
      game_id,
      player_id,
      frame,
      ball1, ball2, ball3,
      -- Get the first ball from the next frame.
      -- Used by strike and spare.
      LEAD(ball1, 1) OVER (
        PARTITION BY game_id, player_id
        ORDER BY frame
      ) AS next_ball_1,
      -- Get the second ball from the next frame.
      -- Used by strike.
      LEAD(ball2, 1) OVER (
        PARTITION BY game_id, player_id
        ORDER BY frame
      ) AS next_ball_2,
      -- Get the first ball from the next next frame.
      -- Used by double-strike.
      LEAD(ball1, 2) OVER (
        PARTITION BY game_id, player_id
        ORDER BY frame
      ) AS next_next_ball_1
    FROM bowling.frame
  ),
  frame_counts AS (
    SELECT
      game_id,
      player_id,
      frame,
      ball1, ball2, ball3,
      CASE
      -- We will start with frame 10: when we have a strike
      -- or spare, we get all three balls.
      WHEN frame = 10 AND ball1 + ball2 >= 10 THEN
        ball1 + ball2 + ball3
      -- On a strike, we get the next two balls. This could
      -- be from the next frame, or include the first ball
      -- of the frame after that. Note that in frame 9, we will
      -- also look at the second ball from fram 10, rather than
      -- looking for a non-existent frame 11.
      WHEN ball1 = 10 THEN
        ball1 + next_ball_1 + (
          CASE WHEN next_ball_1 = 10 AND frame < 9 THEN
            next_next_ball_1
          ELSE
            next_ball_2
          END
        )
      -- In the case of a spare, grab the next ball. We already
      -- handled a spare on frame 10 above.
      WHEN ball1 + ball2 = 10 THEN
        ball1 + ball2 + next_ball_1
      -- Otherwise, it's just the two balls we bowled in this frame.
      ELSE
        ball1 + ball2
      END AS score
    FROM pin_counts
  )

  -- We have everything we need in the previous CTE, except that
  -- shows us the frame score, rather than the running tally.
  -- We need to do that in another window function here, but
  -- only calculate a value when the frame's wave function has
  -- collapsed (ie, it's score is known).
  SELECT
    frame_counts.*,
    CASE WHEN score IS NOT NULL THEN
      SUM(score) OVER (
        PARTITION BY game_id, player_id
        ORDER BY frame
        ROWS UNBOUNDED PRECEDING
      )
    ELSE NULL END AS total
  FROM frame_counts
);

Again, I think this is a simpler query, and easier to read. But, I guess I wrote it.

We can insert the same data as used there, and look at our results:

-- Game 1
INSERT INTO bowling.frame VALUES
  (1, 1, 1, 7, 2, NULL),
  (1, 1, 2, 3, 7, NULL),
  (1, 1, 3, 6, 4, NULL),
  (1, 1, 4, 10, NULL, NULL),
  (1, 1, 5, 10, NULL, NULL),
  (1, 1, 6, 10, NULL, NULL),
  (1, 1, 7, 9, 1, NULL),
  (1, 1, 8, 10, NULL, NULL),
  (1, 1, 9, 8, 1, NULL),
  (1, 1, 10, 6, 3, NULL);

-- Game 2
INSERT INTO bowling.frame VALUES
  (2, 1, 1, 10, NULL, NULL),
  (2, 1, 2, 3, 7, NULL),
  (2, 1, 3, 10, NULL, NULL),
  (2, 1, 4, 6, 4, NULL),
  (2, 1, 5, 10, NULL, NULL),
  (2, 1, 6, 9, 1, NULL),
  (2, 1, 7, 10, NULL, NULL),
  (2, 1, 8, 8, 2, NULL),
  (2, 1, 9, 10, NULL, NULL),
  (2, 1, 10, 7, 3, 10);

-- Game 3
INSERT INTO bowling.frame VALUES
  (3, 1, 1, 10, NULL, NULL),
  (3, 1, 2, 10, NULL, NULL),
  (3, 1, 3, 10, NULL, NULL),
  (3, 1, 4, 10, NULL, NULL),
  (3, 1, 5, 10, NULL, NULL),
  (3, 1, 6, 10, NULL, NULL),
  (3, 1, 7, 10, NULL, NULL),
  (3, 1, 8, 10, NULL, NULL),
  (3, 1, 9, 10, NULL, NULL),
  (3, 1, 10, 10, 10, 10);
$ SELECT * FROM frame_score;

 game_id | player_id | frame | ball1 | ball2  | ball3  | score | total
---------+-----------+-------+-------+--------+--------+-------+-------
       1 |         1 |     1 |     7 |      2 | <NULL> |     9 |     9
       1 |         1 |     2 |     3 |      7 | <NULL> |    16 |    25
       1 |         1 |     3 |     6 |      4 | <NULL> |    20 |    45
       1 |         1 |     4 |    10 | <NULL> | <NULL> |    30 |    75
       1 |         1 |     5 |    10 | <NULL> | <NULL> |    29 |   104
       1 |         1 |     6 |    10 | <NULL> | <NULL> |    20 |   124
       1 |         1 |     7 |     9 |      1 | <NULL> |    20 |   144
       1 |         1 |     8 |    10 | <NULL> | <NULL> |    19 |   163
       1 |         1 |     9 |     8 |      1 | <NULL> |     9 |   172
       1 |         1 |    10 |     6 |      3 | <NULL> |     9 |   181
       2 |         1 |     1 |    10 | <NULL> | <NULL> |    20 |    20
       2 |         1 |     2 |     3 |      7 | <NULL> |    20 |    40
       2 |         1 |     3 |    10 | <NULL> | <NULL> |    20 |    60
       2 |         1 |     4 |     6 |      4 | <NULL> |    20 |    80
       2 |         1 |     5 |    10 | <NULL> | <NULL> |    20 |   100
       2 |         1 |     6 |     9 |      1 | <NULL> |    20 |   120
       2 |         1 |     7 |    10 | <NULL> | <NULL> |    20 |   140
       2 |         1 |     8 |     8 |      2 | <NULL> |    20 |   160
       2 |         1 |     9 |    10 | <NULL> | <NULL> |    20 |   180
       2 |         1 |    10 |     7 |      3 |     10 |    20 |   200
       3 |         1 |     1 |    10 | <NULL> | <NULL> |    30 |    30
       3 |         1 |     2 |    10 | <NULL> | <NULL> |    30 |    60
       3 |         1 |     3 |    10 | <NULL> | <NULL> |    30 |    90
       3 |         1 |     4 |    10 | <NULL> | <NULL> |    30 |   120
       3 |         1 |     5 |    10 | <NULL> | <NULL> |    30 |   150
       3 |         1 |     6 |    10 | <NULL> | <NULL> |    30 |   180
       3 |         1 |     7 |    10 | <NULL> | <NULL> |    30 |   210
       3 |         1 |     8 |    10 | <NULL> | <NULL> |    30 |   240
       3 |         1 |     9 |    10 | <NULL> | <NULL> |    30 |   270
       3 |         1 |    10 |    10 |     10 |     10 |    30 |   300
(30 rows)

Building the average scores for a player is likewise similar. Because I’m using a VIEW, I can jut reference that.

SELECT
  player_id,
  AVG(total) as average
FROM frame_score
WHERE frame=10
GROUP BY player_id;
 player_id |       average
-----------+----------------------
         1 | 227.0000000000000000
(1 row)

I’m fairly sure I’ve rewritten the constraints correctly, but may have missed some. Here are some of the condition tests that show invalid constraints:

$ INSERT INTO bowling.frame VALUES(1, 2, 0, 9, NULL, NULL);
ERROR:  value for domain frame_number violates check constraint "frame_number_check"
Time: 0.405 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 1, 11, NULL, NULL);
ERROR:  value for domain ball violates check constraint "ball_check"
Time: 0.215 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 1, -1, NULL, NULL);
ERROR:  value for domain ball violates check constraint "ball_check"
Time: 0.218 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 1, 8, 3, NULL);
ERROR:  new row for relation "frame" violates check constraint "max_spare_unless_frame_10_strike"
DETAIL:  Failing row contains (1, 2, 1, 8, 3, null).
Time: 0.332 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 1, 8, 1, 1);
ERROR:  new row for relation "frame" violates check constraint "ball3_only_if_eligible"
DETAIL:  Failing row contains (1, 2, 1, 8, 1, 1).
Time: 0.392 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 1, 8, 2, 1);
ERROR:  new row for relation "frame" violates check constraint "ball_3_only_in_frame_10"
DETAIL:  Failing row contains (1, 2, 1, 8, 2, 1).
Time: 0.327 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 10, 8, 3, 1);
ERROR:  new row for relation "frame" violates check constraint "max_spare_unless_frame_10_strike"
DETAIL:  Failing row contains (1, 2, 10, 8, 3, 1).
Time: 0.340 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 10, 8, 2, 11);
ERROR:  value for domain ball violates check constraint "ball_check"
Time: 0.200 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 10, 10, NULL, 10);
ERROR:  new row for relation "frame" violates check constraint "ball3_only_if_eligible"
DETAIL:  Failing row contains (1, 2, 10, 10, null, 10).
Time: 0.316 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 5, 10, 0, NULL);
ERROR:  new row for relation "frame" violates check constraint "ball_2_never_bowled_after_strike"
DETAIL:  Failing row contains (1, 2, 5, 10, 0, null).
Time: 0.307 ms
$ INSERT INTO bowling.frame VALUES(1, 2, 10, 10, 2, 9);
ERROR:  new row for relation "frame" violates check constraint "ball3_max_spare_or_strike"
DETAIL:  Failing row contains (1, 2, 10, 10, 2, 9).
Time: 0.323 ms

Finally, I rewrote the pretty printer. It’s not quite perfect (I don’t like how I get the plus signs at the newline character), but it is workable:

WITH symbols AS (
  SELECT
    game_id, player_id, frame,
    CASE WHEN ball1 = 10 THEN 'X' ELSE ball1::text END as ball1,
    CASE WHEN ball2 IS NULL THEN ' '
         WHEN ball1 + ball2 = 10 THEN '/'
         WHEN ball1 = 10 AND ball2 = 10 THEN 'X'
         ELSE ball2::text
         END as ball2,
    CASE WHEN ball3 IS NULL THEN ' '
    WHEN ball3 = 10 THEN 'X'
    WHEN ball3 + ball2 = 10 THEN '/'
    ELSE ball3::text
    END as ball3,
    lpad(total::text, 5, ' ') as total
  FROM
    frame_score
  ORDER BY game_id, player_id, frame
), grouped_data AS (
  SELECT
    game_id,
    player_id,
    array_agg(ball1) ball1,
    array_agg(ball2) ball2,
    array_agg(ball3) ball3,
    array_agg(total) total
  FROM
    symbols
  GROUP BY
    game_id, player_id
)
SELECT
  game_id,
  player_id,
  ball1[1] || ' | ' || ball2[1] || ' ' || chr(10) || total[1] AS "1",
  ball1[2] || ' | ' || ball2[2] || ' ' || chr(10) || total[2] AS "2",
  ball1[3] || ' | ' || ball2[3] || ' ' || chr(10) || total[3] AS "3",
  ball1[4] || ' | ' || ball2[4] || ' ' || chr(10) || total[4] AS "4",
  ball1[5] || ' | ' || ball2[5] || ' ' || chr(10) || total[5] AS "5",
  ball1[6] || ' | ' || ball2[6] || ' ' || chr(10) || total[6] AS "6",
  ball1[7] || ' | ' || ball2[7] || ' ' || chr(10) || total[7] AS "7",
  ball1[8] || ' | ' || ball2[8] || ' ' || chr(10) || total[8] AS "8",
  ball1[9] || ' | ' || ball2[9] || ' ' || chr(10) || total[9] AS "9",
  ball1[10] || ' | ' || ball2[10] || ' | ' || ball3[10] || ' ' || chr(10) || lpad(total[10], 9, ' ') AS "10"
FROM grouped_data;
 game_id | player_id |   1    |   2    |   3    |   4    |   5    |   6    |   7    |   8    |   9    |     10
---------+-----------+--------+--------+--------+--------+--------+--------+--------+--------+--------+------------
       1 |         1 | 7 | 2 +| 3 | / +| 6 | / +| X |   +| X |   +| X |   +| 9 | / +| X |   +| 8 | 1 +| 6 | 3 |   +
         |           |     9  |    25  |    45  |    75  |   104  |   124  |   144  |   163  |   172  |       181
       2 |         1 | X |   +| 3 | / +| X |   +| 6 | / +| X |   +| 9 | / +| X |   +| 8 | / +| X |   +| 7 | / | X +
         |           |    20  |    40  |    60  |    80  |   100  |   120  |   140  |   160  |   180  |       200
       3 |         1 | X |   +| X |   +| X |   +| X |   +| X |   +| X |   +| X |   +| X |   +| X |   +| X | X | X +
         |           |    30  |    60  |    90  |   120  |   150  |   180  |   210  |   240  |   270  |       300
(3 rows)

That will do for now. Corrections welcome!

Postgres Tree Shootout part 2: Adjacency List using CTEs

This is the second post in an ongoing series dealing with storing Hierarchical or Tree data structures in Postgres. You should read the Introduction if you haven’t already.

This post contains the queries that illustrate how an Adjacency List model can be used to represent a Hierarchical set of data, including data definitions, and the various operations that have been defined in the aforementioned introduction.

I’ve discussed Adjacency Lists in the past, but I’ll quickly recap why I think they are good.

  • They are conceptually simple to understand
  • They enforce referential integrity
  • They can be modelled with most ORMs without any extra infrastructure
  • Many of the operations are non-complex
  • Recursive queries allow us to perform the complex queries in reasonable time

To help build suspense (but more because I haven’t yet come up with a way to generate a nice reproducible, yet complex tree), this post may discuss the complexity of the queries, but will not contain any measurements.

Initial tree

Before each operation, our data will look like this (where parents point to children):

dc:date2014-11-26 11:27Z</dc:date>Canvas 1Layer 112345678910111213141516

We will assume reversion back to this structure after each operation: we could do this using a TRUNCATE followed by an INSERT; or we could run the operation in a transaction and rollback.

There may be a post which shows the effects of each of the queries below in a graphical form.

Table structure

Adjacency Lists are dead simple. Each node simply contains a reference to it’s parent node.

CREATE TABLE nodes (
  node_id SERIAL PRIMARY KEY,
  parent_id INTEGER REFERENCES nodes(node_id)
);

We can insert our data using a single statement:

INSERT INTO nodes VALUES
  (1, NULL),
  (2, 1),
  (3, 1),
  (4, 2),
  (5, 2),
  (6, 3),
  (7, 3),
  (8, 4),
  (9, 8),
  (10, NULL),
  (11, 10),
  (12, 11),
  (13, 11),
  (14, 12),
  (15, 12),
  (16, 12);

Insertions

Inserting a single leaf node is simple. To insert a single node as a child of node 13, for example:

INSERT INTO nodes (parent_id) VALUES (13);

Inserting a new root node is slightly more complicated. In most ORMs, we would probably do it in two queries: one to create the new node, and a second to update the other root nodes to point to this one. We’ll see that below.

We can do slightly better in raw SQL: UPDATE our table with the result of an INSERT ... RETURNING that occurs inside a Common Table Expression (CTE, or WITH query).

WITH parent AS (
  INSERT INTO nodes(parent_id)
  VALUES (NULL)
  RETURNING node_id
)
UPDATE nodes
SET parent_id = parent.node_id
FROM parent
WHERE parent_id IS NULL;

We can use the same pattern to insert an intermediate node in our tree. For instance, inserting a new node between nodes 11 and 12:

WITH created_node AS (
  INSERT INTO nodes(parent_id)
  VALUES (11)
  RETURNING node_id
)
UPDATE nodes
SET parent_id = created_node.node_id
FROM created_node
WHERE nodes.node_id = 12;

And our last insert, adding a child node, that gets it’s siblings as children. For instance, adding a new node under node 12, which gets all of node 12’s children as it’s children.

WITH created_node AS (
  INSERT INTO nodes(parent_id)
  VALUES (12)
  RETURNING node_id
)
UPDATE nodes
SET parent_id = created_node.node_id
FROM created_node
WHERE nodes.parent_id = 12;

All of these queries should perform relatively well: the CTE will be very simple (as it is no different to the single leaf insert), and the UPDATE should likewise be fairly simple: it needs to filter out which existing nodes do not need to be updated; and then it needs to update the remainder of the rows with the value pulled from the CTE.

This theoretically is only marginally more complex than just a simple UPDATE foo SET bar=baz WHERE quux IS NULL style query.

If we were using an ORM, we might need to do this in two queries: something like this (in Django):

# Insert new root node: all other root nodes now have this as a parent
new_node = Node.objects.create()
Node.objects.filter(parent=None).exclude(pk=new_node.pk).update(parent=new_node)
# Could possibly do as:
Node.objects.filter(parent=None).update(parent=Node.objects.create().pk)

# Insert new node, with a single child as it's child (and that child's previous
# parent as it's parent)
new_node = Node.objects.create(parent=old_node.parent)
old_node.parent = new_node
old_node.save()

# Insert new node, with children of that node's parent now children of the node.
new_node = parent_node.children.create()
parent_node.children.exclude(pk=new_node.pk).update(parent=new_node)
# Again, may be able to do:
parent_node.children.update(parent=parent_node.children.create().pk)

Note the required exclusion of the newly created node: we don’t have to do this in the CTE versions, as that doesn’t “exist” at the time the other part of the query runs.

Removals

Removing a single leaf node is no different than removing a row from a normal table. Removing node 9, for instance:

DELETE FROM nodes WHERE node_id = 9;

Because the information about parent-child relationships is stored in the child, we do not need to do anything else to maintain the tree.

To remove a single root node (in this case, node 1), and promote all children to root nodes themselves, we can do two queries:

UPDATE nodes SET parent_id = NULL WHERE parent_id = 1;
DELETE FROM nodes WHERE node_id = 1;

It may be possible to do this in a single query, similar to the CTE queries above, but I’m not sure of the benefit.

WITH deleted AS (
  DELETE FROM nodes
  WHERE node_id = 1
)
UPDATE nodes SET parent_id = NULL WHERE parent_id = 1;

The same pattern can be used for removing a node, and attaching it’s children to it’s parent. Here, we will remove node 2, and attach it’s children (4 and 5) as children of it’s parent, node 1:

UPDATE nodes
SET parent_id = (SELECT parent_id FROM nodes WHERE node_id = 2)
WHERE parent_id = 2;

DELETE from nodes WHERE node_id = 2;

This is a place where using a CTE might make things clearer - especially if we have the node-to-be-deleted’s id, but not it’s parent:

WITH deleted AS (
  DELETE FROM nodes
  WHERE node_id = 2
  RETURNING node_id, parent_id
)
UPDATE nodes
SET parent_id = deleted.parent_id
FROM deleted
WHERE nodes.parent_id = deleted.node_id;

Righto, now we are up to the traditionally “hard” things for an Adjacency List to perform. Dealing with removing an arbitrary depth of (sub)tree.

We’ll need to create a recursive CTE, and delete according to that. Let’s just select from that initially, so we can see what the CTE data will look like:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
)
SELECT * FROM tree;
 node_id | ancestors
---------+------------
       1 | {}
      10 | {}
       2 | {1}
       3 | {1}
      11 | {10}
       4 | {1,2}
       5 | {1,2}
       6 | {1,3}
       7 | {1,3}
      12 | {10,11}
      13 | {10,11}
       8 | {1,2,4}
      14 | {10,11,12}
      15 | {10,11,12}
      16 | {10,11,12}
       9 | {1,2,4,8}
(16 rows)

Coolio. So, on to our operations. Let’s remove the subtree starting with node 2. I’ll hide the CTE, since it will be the same for quite a few of these operations:

WITH RECURSIVE tree AS (...)
DELETE FROM nodes
WHERE node_id IN (
  SELECT node_id FROM tree WHERE 2 = ANY(tree.ancestors)
) OR node_id = 2;

The query is identical for a full tree (node 1 and descendants):

WITH RECURSIVE tree AS (...)
DELETE FROM nodes
WHERE node_id IN (
  SELECT node_id FROM tree WHERE 1 = ANY(tree.ancestors)
) OR node_id = 1;

And it’s nearly identical for just the descendants of a given node. Here, for all of node 2’s descendants, but not that node itself:

WITH RECURSIVE tree AS (...)
DELETE FROM nodes
WHERE node_id IN (
  SELECT node_id FROM tree WHERE 2 = ANY(tree.ancestors)
);

Moves

Because the relationship is stored purely on the child element, moving around trees and subtrees is very easy. We can start with moving subtree starting with 3 to underneath node 4:

UPDATE nodes
SET parent_id = 4 WHERE node_id = 3;

Nothing surprising there. Similarly, the query is identical for moving a leaf to a different parent, a root node into a tree, and turning a subtree into a full tree (making that node a root node).

UPDATE nodes SET parent_id = 6 WHERE node_id = 5;
UPDATE nodes SET parent_id = 8 WHERE node_id = 10;
UPDATE nodes SET parent_id = NULL WHERE node_id = 2;

The final move: all of node’s children to a different node is almost as simple:

UPDATE nodes SET parent_id = 5 WHERE parent_id = 12;

This seems to be a situation where Adjacency Lists are really good. None of these queries are any more complex than the simplest UPDATE you could think of.

Fetches

Using the same CTE, we can perform our fetches. We may need to extend it to deal with depths, but since the ancestors column contains ancestors starting with the root node, we could count stuff in there. Let’s see how it goes.

Descendants

Fetching all descendants of a given node just means we want to see if the node occurs at all in each row’s ancestors. To get all of node 10’s descendants:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
)
SELECT node_id FROM tree WHERE 10 = ANY(tree.ancestors);

However, we could improve this by starting with just the node we care about, or more specifically, it’s children:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[10]::integer[] AS ancestors FROM nodes WHERE parent_id = 10

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
)
SELECT node_id FROM tree;

Obviously, this is far less generic, but it is also significantly less complex. For starters, it only builds up the part of the tree we care about, and then just returns the node ids, rather than building up the whole tree, and then discarding the parts that are not required.

The same code can be used for determining the number of descendants, but with a COUNT(node_id) in the final query.

To get our depth-limited query, we can approach from two directions. To get the subtree to depth 2 from above:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[10]::integer[] AS ancestors FROM nodes WHERE parent_id = 10

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
  AND cardinality(tree.ancestors) < 2
)
SELECT node_id FROM tree;

To do the same in the more generic form have to look at how close the desired node is to the end of the ancestors array:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
)
SELECT node_id
FROM tree
WHERE ARRAY_POSITION(ancestors, 10) < ARRAY_LENGTH(ancestors, 1) - 2;

(Note that this is a bug fix on the original version of this post).

Ancestors

Fetching ancestors from our generic CTE is a bit simpler, because that data is already part of the query:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
) SELECT unnest(ancestors) FROM tree WHERE node_id = 15;

To do the equivalent of the hand-built CTE, we would need to start with the node, and build back the other way. It’s getting late here, so I can’t think of a way to do this right now that doesn’t get stuck doing infinite recursion.

The count query is an interesting one: we can just remove the need to unnest, and take the cardinality:

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, tree.ancestors || nodes.parent_id
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
) SELECT cardinality(ancestors) FROM tree WHERE node_id = 15;

The depth query is a little trickier. We want to know the ancestors of node 15, up to a depth of 2. If our ancestors array was in the reverse order, we should be able to unnest and limit.

WITH RECURSIVE tree AS (
  SELECT node_id, ARRAY[]::integer[] AS ancestors
  FROM nodes WHERE parent_id IS NULL

  UNION ALL

  SELECT nodes.node_id, nodes.parent_id || tree.ancestors
  FROM nodes, tree
  WHERE nodes.parent_id = tree.node_id
) SELECT unnest(ancestors) FROM tree WHERE node_id = 15 LIMIT 2;

We can do this because a node only has one parent: so limiting the number of ancestors (when sorted nearest ancestor first) is the same as limiting the depth.

Special queries

Fetching all leaf nodes is just a matter of excluding those that have a relationship to another node as it’s parent:

SELECT node_id FROM nodes
WHERE node_id NOT IN (
  SELECT parent_id FROM nodes WHERE parent_id IS NOT NULL
);

Trick for new players: if you leave off the WHERE clause in that sub-query, you won’t get any matches!

Fetching the number of leaf nodes is trivial.

Fetching root nodes (or the number of) is simpler than leaf nodes:

SELECT node_id FROM nodes
WHERE parent_id IS NULL;

Fetching non-leaf nodes, and non-root nodes is just negations of the two queries above:

SELECT node_id FROM nodes WHERE node_id IN (
  SELECT parent_id FROM nodes WHERE parent_id IS NOT NULL
);

SELECT node_id FROM nodes WHERE parent_id IS NOT NULL;

And the non-leaf, non-root nodes just combines these two queries:

SELECT node_id FROM nodes WHERE node_id IN (
  SELECT parent_id FROM nodes WHERE parent_id IS NOT NULL
) AND parent_id IS NOT NULL;

As an aside: there is also the inverse of this: nodes which are isolated (root AND leaf nodes):

SELECT node_id FROM nodes
WHERE parent_id IS NULL
AND node_id NOT IN (
  SELECT parent_id FROM nodes WHERE parent_id IS NOT NULL
);

Well, that’s our operations. Most of them are really simple. For anything that requires us to fetch or delete a whole subtree, we needed to revert to recursive CTEs, and for some of the other operations, using a CTE makes it simpler (and easier to understand).

Next, we will look at an alternative to the CTE operations, using a recursive view. From there, we should be able to look at a trigger-based approach that materializes our tree (node, ancestors) data in a table, and keeps it up to date. That’s, as I hinted, getting close to a Materialized Path approach, but keeps the conceptual simplicity of the Adjacency List, and hopefully prevents possible issues relating to referential integrity.

Postgres Tree Shootout part 1: Introduction.

I’ve written before about using Adjacency Lists, and even done some performance tests on querying them. Whilst reading a post today, it occurred to me that it might be worthwhile to do a comparison of the various methods of storing hierarchical data in Postgres, and the costs of the same operations on each of those.

This post is just an introduction, with an outline of what I plan to do to run these tests. Please feel free to suggest things that I have missed, or that might be an oversight at my end.


Tree Models

There are four methods of storing the relationships that might form a tree. This analysis will be limited to actual tree, rather than graph structures (no cycles). I plan to detail the data structures in a series of posts, one per method. In each case, where there are multiple ways to store the data, I will attempt to examine each of these.

Adjacency Lists, being the simplest to understand (and the ones I have spent more time on recently), will be discussed first.

Path Enumerations will be next, with a comparison of storing the data using the ltree extension, and using an ARRAY column.

Following this, I’ll make an attempt at using the Closure Table model: where each ancestor-descendant relationship is stored, rather than just the parent-child relationship.

Finally, I’ll have a crack at the Nested Set model. I’m not solidly behind this model for the types of data I’ve had to deal with, but it is a valid mechanism for storing and retrieving this data. Besides, it will be an interesting exercise to implement.

My plan to handle all of these is that all tree manipulation should be “automatic”, that is, adding a node (or removing one, or whatever) should not require explicit updating of the various metadata. This should all be handled by trigger functions on the tables themselves. Whether this turns out to be reasonable we shall see.


Operations

I plan to perform the same set of operations (on the same data, rather than randomly generated data) in all models, and compare the complexity and run-time of the various queries. I’m hoping to cover all of the operations that might be performed on a tree structure, so please add any more to the comments.

The data stored in the table will contain more than one tree: this means we can perform operations which add/remove root nodes/whole trees.

Insertions

  • Insert a single leaf node
  • Insert a single root node (all existing root nodes will then point to this)
  • Insert a single node partway through the tree, with the “replaced” node becoming a child of this (and this one keeps it’s children)
  • Insert a single node partway through the tree, with this node’s parent’s existing children all becoming children of the new node.

Removals

  • Remove a single leaf node
  • Remove a single root node (all children of this are promoted to root nodes)
  • Remove a single node partway through the tree: all children of this node then have their grand-parent as their parent.
  • Remove a subtree (a single non-root node and it’s descendants)
  • Remove a whole tree (a single root node and all descendants)
  • Remove all descendants of a specific node (but not the node itself)

Moves

  • Move a subtree from one parent to another
  • Move a single leaf node to a different parent
  • Move a root node into a tree
  • Make a subtree into a tree (turn a node into a root node).
  • Move all children of a node to a different parent

Fetches

  • Fetch all descendants of a given node
  • Fetch the number of descendants of a given node
  • Fetch descendants of a given node to a given depth
  • Fetch the number of descendants of a given node to a given depth
  • Fetch all ancestors of a given node
  • Fetch the number of ancestors of a given node
  • Fetch ancestors of a given node to a given depth
  • Fetch the number of ancestors of a given node to a given depth I don’t think this makes any sense.
  • Fetch all leaf nodes
  • Fetch the number of leaf nodes
  • Fetch all root nodes
  • Fetch the number of root nodes
  • Fetch all non-leaf nodes
  • Fetch the number of non-leaf nodes
  • Fetch all non-root nodes
  • Fetch the number of non-root nodes
  • Fetch all non-root, non-leaf nodes
  • Fetch the number of non-root, non-leaf nodes